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The OR Formalization Drive

Help us formalize the operations research literature in Lean.

1094 missions

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Control TheoryOperations ResearchOptimization·Captain: mikedeng1

Optimizing Static Linear Feedback: Gradient Method I: The Gradient Method Converges to a Stationary Point, and Linearly to the Optimal Gain under State FeedbackResearch Paper

Motivation

The linear-quadratic regulator (LQR) is the basic problem of optimal control: steer a linear system x˙=Ax+Bu\dot x = Ax + Bux˙=Ax+Bu so as to minimize an integrated quadratic cost. When the full state is measured and the gain may be chosen freely, the optimal feedback is given by the algebraic Riccati equation (Kalman, 1960). In many applications only an output y=Cxy = Cxy=Cx is measured, and the controller is restricted to a static feedback u=−Kyu = -Kyu=−Ky. For this output-feedback problem no Riccati-type characterization exists; the design problem is a non-convex optimization over the gain matrix KKK.

Direct optimization of the gain by gradient descent, known in the control literature since Levine and Athans (1970) and revived in reinforcement learning as policy gradient (Fazel, Ge, Kakade and Mesbahi, 2018, arXiv:1801.05039), is therefore of interest both to control engineers and to the learning community. Fatkhullin and Polyak (arXiv:2004.09875, SIAM J. Control Optim. 2021) give a self-contained analysis of the continuous-time problem: the cost is coercive on the set of stabilizing gains, smooth on sublevel sets, and, for state feedback, satisfies a gradient-domination (Łežanski–Polyak–Łojasiewicz) inequality. From these they derive convergence guarantees for the gradient method.

Setting

Fix real matrices A∈Rn×nA\in\mathbb R^{n\times n}A∈Rn×n, B∈Rn×mB\in\mathbb R^{n\times m}B∈Rn×m, C∈Rr×nC\in\mathbb R^{r\times n}C∈Rr×n and weights Q∈Rn×nQ\in\mathbb R^{n\times n}Q∈Rn×n, R∈Rm×mR\in\mathbb R^{m\times m}R∈Rm×m, and an initial-state covariance Σ∈Rn×n\Sigma\in\mathbb R^{n\times n}Σ∈Rn×n. A gain is a matrix K∈Rm×rK\in\mathbb R^{m\times r}K∈Rm×r, and the closed-loop matrix is AK=A−BKCA_K = A - BKCAK​=A−BKC. A square matrix is Hurwitz if all its complex eigenvalues have negative real part. The set of stabilizing gains is

S={K∈Rm×r:AK is Hurwitz}.\mathcal S = \{K\in\mathbb R^{m\times r} : A_K \text{ is Hurwitz}\}.S={K∈Rm×r:AK​ is Hurwitz}.

For K∈SK\in\mathcal SK∈S let X(K)X(K)X(K) be the unique solution of the Lyapunov equation

AK⊤X+XAK+C⊤K⊤RKC+Q=0,A_K^\top X + XA_K + C^\top K^\top RKC + Q = 0,AK⊤​X+XAK​+C⊤K⊤RKC+Q=0,

and define the cost f(K)=Tr(X(K)Σ)f(K)=\mathrm{Tr}\big(X(K)\Sigma\big)f(K)=Tr(X(K)Σ), the expected integrated quadratic cost of the closed loop from a random initial state with covariance Σ\SigmaΣ. With Y(K)Y(K)Y(K) the solution of AKY+YAK⊤+Σ=0A_KY+YA_K^\top+\Sigma=0AK​Y+YAK⊤​+Σ=0, the gradient of fff in the Frobenius inner product is

∇f(K)=2(RKC−B⊤X(K))Y(K)C⊤.\nabla f(K)=2\big(RKC-B^\top X(K)\big)Y(K)C^\top .∇f(K)=2(RKC−B⊤X(K))Y(K)C⊤.

A known stabilizing gain K0∈SK_0\in\mathcal SK0​∈S is given, and S0={K∈S:f(K)≤f(K0)}\mathcal S_0=\{K\in\mathcal S: f(K)\le f(K_0)\}S0​={K∈S:f(K)≤f(K0​)} is its sublevel set. The standing assumptions are Q,R,Σ≻0Q,R,\Sigma\succ0Q,R,Σ≻0, rank⁡C=r\operatorname{rank}C=rrankC=r and B≠0B\neq0B=0. State feedback (SLQR) is the case C=IC=IC=I.

The gradient method with step sizes γj\gamma_jγj​ is

Kj+1=Kj−γj∇f(Kj),j≥0.K_{j+1}=K_j-\gamma_j\nabla f(K_j),\qquad j\ge0 .Kj+1​=Kj​−γj​∇f(Kj​),j≥0.

A number L>0L>0L>0 is a smoothness constant if ∥∇f(K)−∇f(K′)∥F≤L∥K−K′∥F\|\nabla f(K)-\nabla f(K')\|_F\le L\|K-K'\|_F∥∇f(K)−∇f(K′)∥F​≤L∥K−K′∥F​ for all K,K′∈S0K,K'\in\mathcal S_0K,K′∈S0​.

Formalization targets

Goal: Theorem 4.2 for state feedback

For C=IC=IC=I, an optimal gain K∗∈SK_*\in\mathcal SK∗​∈S, and any smoothness constant LLL:

  1. if 0<γj≤2/L0<\gamma_j\le 2/L0<γj​≤2/L for all jjj, then every Kj∈S0K_j\in\mathcal S_0Kj​∈S0​ and
f(Kj+1)≤f(Kj)−γj(1−Lγj2)∥∇f(Kj)∥F2;f(K_{j+1})\le f(K_j)-\gamma_j\Big(1-\frac{L\gamma_j}{2}\Big)\|\nabla f(K_j)\|_F^2 ;f(Kj+1​)≤f(Kj​)−γj​(1−2Lγj​​)∥∇f(Kj​)∥F2​;
  1. if 0<ε1≤γj≤2/L−ε20<\varepsilon_1\le\gamma_j\le 2/L-\varepsilon_20<ε1​≤γj​≤2/L−ε2​ with ε2>0\varepsilon_2>0ε2​>0, then ∇f(Kj)→0\nabla f(K_j)\to0∇f(Kj​)→0,
min⁡0≤j≤k∥∇f(Kj)∥F2≤f(K0)c1k(k≥1),c1=ε1ε2L2,\min_{0\le j\le k}\|\nabla f(K_j)\|_F^2\le\frac{f(K_0)}{c_1k}\quad(k\ge1),\qquad c_1=\frac{\varepsilon_1\varepsilon_2L}{2},0≤j≤kmin​∥∇f(Kj​)∥F2​≤c1​kf(K0​)​(k≥1),c1​=2ε1​ε2​L​,

and there are c≥0c\ge0c≥0, 0≤q<10\le q<10≤q<1 with ∥Kj−K∗∥F≤c qj\|K_j-K_*\|_F\le c\,q^j∥Kj​−K∗​∥F​≤cqj.

Milestones

In attack order:

  • Appendix A lemmas. Trace duality of dual Lyapunov equations (Lemma A.1), the trace sandwich (Lemma A.4), and eigenvalue lower bounds for Lyapunov solutions (Lemma A.5).
  • Coercivity and existence. Coercivity of fff with the lower bounds (3.1)–(3.2) (Lemma 3.8), boundedness of S0\mathcal S_0S0​ (Corollary 3.9), and existence of a minimizer (Corollary 3.10).
  • Smoothness. The gradient formula (Lemma 3.11) and existence of a smoothness constant on S0\mathcal S_0S0​ (Theorem 3.15, qualitative form).
  • Gradient domination for state feedback. Lemmas C.2, C.3 and C.1, and the LPL inequality with the explicit constant (3.11):
12∥∇f(K)∥F2≥μ(f(K)−f(K∗)),K∈S0(Theorem 3.17).\tfrac12\|\nabla f(K)\|_F^2\ge\mu\big(f(K)-f(K_*)\big),\qquad K\in\mathcal S_0 \qquad\text{(Theorem 3.17)}.21​∥∇f(K)∥F2​≥μ(f(K)−f(K∗​)),K∈S0​(Theorem 3.17).
  • Theorem 4.2 for output feedback. Descent and stationarity, parts 1 and 2 without the linear rate, for general CCC.

Significance

The theorem shows that a plain first-order method, started from any stabilizing gain, never destabilizes the closed loop and decreases the cost monotonically, for output feedback as well as state feedback. For state feedback it converges globally and linearly to the optimal gain. The cost is non-convex, and its domain S\mathcal SS is open, possibly non-convex and unbounded, so this does not follow from convex optimization theory. It is the continuous-time counterpart of the policy-gradient guarantees of Fazel et al. for discrete-time LQR, and it underlies model-free and data-driven variants of gain tuning.

The result is proved in the paper, but it has not been formalized. The formalization adds three things. It makes the invariance argument (the iterates stay in S0\mathcal S_0S0​) explicit, and the paper describes that argument as the non-trivial part. It corrects the statements where the printed text is wrong (see below). It also produces a reusable library of Lyapunov-equation facts. Mathlib has no Lyapunov equation, no LQR cost and no Hurwitz stability theory, and the platform has no continuous-time LQR material. The nearest platform items treat discrete-time Riccati iteration (BertsekasDP.riccati_convergence_stability) and Polyak–Łojasiewicz rates on a whole normed space (ShiOptRates.pl_rate). Neither applies to a function defined only on a non-convex open subset.

Difficulty

The standard descent-lemma argument assumes fff is defined and LLL-smooth on the whole space. Here fff is defined only on S\mathcal SS, and it is not smooth on all of S\mathcal SS: it blows up at the boundary. A gradient step from a point of S0\mathcal S_0S0​ could in principle jump out of S\mathcal SS, where the Lyapunov equation has no meaningful solution. The smoothness bound is available only inside S0\mathcal S_0S0​, so the argument must show that the whole segment from KjK_jKj​ to Kj+1K_{j+1}Kj+1​ stays in S0\mathcal S_0S0​ before the descent inequality can be used on it. That requires coercivity, compactness of S0\mathcal S_0S0​ and an exit-time argument. For the linear rate, gradient domination has to be established on S0\mathcal S_0S0​ with constants controlled by f(K0)f(K_0)f(K0​), and passing from function values to distances to K∗K_*K∗​ needs that minimizer's structure. Gradient domination fails for output feedback (the paper's Example 3.4 has two disconnected components with different minima), so the linear rate is stated only for C=IC=IC=I.

Formalization scope

Matrices are Matrix (Fin p) (Fin q) ℝ. Hurwitz means every element of the complex spectrum has negative real part. X(K)X(K)X(K), Y(K)Y(K)Y(K) are "the unique solution of the Lyapunov equation, 000 if there is none or several"; this junk value is never used, because every statement evaluates fff and ∇f\nabla f∇f only at gains proved or assumed to lie in S\mathcal SS. The iterates' membership in S0\mathcal S_0S0​ is a conclusion of the goal, never a hypothesis; assuming it would delete the theorem's content. ∇f\nabla f∇f is defined by the formula (3.3), and Lemma 3.11 is the theorem that it is the gradient. ∥⋅∥F\|\cdot\|_F∥⋅∥F​ is ∑Mij2\sqrt{\sum M_{ij}^2}∑Mij2​​, ∥⋅∥\|\cdot\|∥⋅∥ is the spectral (operator) norm, and λ1,λn\lambda_1,\lambda_nλ1​,λn​ are the minimum and maximum eigenvalue of a symmetric matrix. State feedback is the instance r=nr=nr=n, C=1C=1C=1. In (4.6) the Frobenius norm replaces the paper's spectral norm, which is equivalent because ccc is existential. The minimum over 0≤j≤k0\le j\le k0≤j≤k requires k≥1k\ge1k≥1.

Deviations from the printed text, each recorded in the item's Formalization Note:

  • The smoothness constant. The explicit LLL of (3.8) is false as printed (for n=m=1n=m=1n=m=1, A=0A=0A=0, B=100B=100B=100, Q=100Q=100Q=100, R=10−3R=10^{-3}R=10−3, Σ=0.1\Sigma=0.1Σ=0.1, K0=10−6K_0=10^{-6}K0​=10−6, one has f′′(K0)=2Lf''(K_0)=2Lf′′(K0​)=2L). The goal therefore takes LLL as any Lipschitz constant of ∇f\nabla f∇f on S0\mathcal S_0S0​, which is the paper's definition of LLL-smoothness (§3.6) and all that its proof uses. Theorem 3.15 enters only as "some such L>0L>0L>0 exists".
  • Lemma C.1. It is stated with λ12(Σ)\lambda_1^2(\Sigma)λ12​(Σ) in the denominator, as its proof concludes and as (3.11) requires.
  • Lemma A.5. It is stated for A⊤X+XA+Q=0A^\top X+XA+Q=0A⊤X+XA+Q=0; the printed −Q-Q−Q admits no positive definite solution.
  • The gain space. S⊆Rm×r\mathcal S\subseteq\mathbb R^{m\times r}S⊆Rm×r, where p. 3 prints Rm×n\mathbb R^{m\times n}Rm×n.

Not stated: Theorem 4.3 and Algorithm 4.1, Lemma 3.6, Lemmas 3.12–3.14, Corollary 3.16 and the explicit constant (3.8). Welcome contributions include a Lyapunov-equation library (existence, uniqueness, integral representation, positivity), continuity of the spectrum, and the exit-time argument, which is reusable for any descent method on a sublevel set of an open domain.

Selected references

  • I. Fatkhullin, B. Polyak, Optimizing Static Linear Feedback: Gradient Method, SIAM J. Control Optim. 59(5), 2021; preprint arXiv:2004.09875v2. https://arxiv.org/abs/2004.09875
  • M. Fazel, R. Ge, S. Kakade, M. Mesbahi, Global Convergence of Policy Gradient Methods for the Linear Quadratic Regulator, ICML 2018. https://arxiv.org/abs/1801.05039
  • W. Levine, M. Athans, On the determination of the optimal constant output feedback gains for linear multivariable systems, IEEE Trans. Automat. Control 15(1), 1970. https://doi.org/10.1109/TAC.1970.1099363
  • H. Karimi, J. Nutini, M. Schmidt, Linear Convergence of Gradient and Proximal-Gradient Methods Under the Polyak–Łojasiewicz Condition, ECML PKDD 2016. https://arxiv.org/abs/1608.04636
  • R. E. Kalman, Contributions to the theory of optimal control, Bol. Soc. Mat. Mexicana 5, 1960.
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Convex OptimizationOperations ResearchOptimization·Captain: mikedeng1

The Generalized Quasi-Variational Inequality Problem II: Existence via Projection and the Brouwer Fixed Point TheoremResearch Paper

Motivation

A variational inequality asks for a point xxx of a set K⊆RnK\subseteq\mathbb R^nK⊆Rn at which a vector field fff makes a non-obtuse angle with every feasible direction: (x′−x)Tf(x)≥0(x'-x)^T f(x)\ge 0(x′−x)Tf(x)≥0 for all x′∈Kx'\in Kx′∈K. It is the common form of the first-order optimality condition of a constrained optimization problem, of complementarity problems in mathematical programming, and of equilibrium conditions in traffic networks and economics. Two generalizations are standard in operations research. In a quasi-variational inequality the constraint set depends on the unknown, K=K(x)K=K(x)K=K(x), as in generalized Nash games where each player's feasible set depends on the other players' choices. In a generalized variational inequality the vector field is set-valued, y∈f(x)y\in f(x)y∈f(x), as when fff is the subdifferential of a nonsmooth convex function.

D. Chan and J. S. Pang (Math. Oper. Res. 7 (1982) 211–222) introduced the problem that combines both, the generalized quasi-variational inequality (GQVI), and proved existence theorems for it. Their §5 gives a second route to existence, independent of the set-valued fixed point theory of their §3: a solution is a fixed point of a map built from Euclidean projections, and for single-valued continuous fff the Brouwer fixed point theorem produces one. The characterization of solutions as projection fixed points, for the generalized variational inequality, is due to Fang and Peterson (reference [11] of the paper, a 1979 University of Maryland Baltimore County research report). This mission formalizes that projection route.

Setting

Work in Rn\mathbb R^nRn with the Euclidean inner product xTyx^TyxTy and norm ∥x∥\|x\|∥x∥. A point-to-set mapping KKK assigns to each x∈Rnx\in\mathbb R^nx∈Rn a subset K(x)⊆RnK(x)\subseteq\mathbb R^nK(x)⊆Rn; a point-to-point mapping fff assigns a vector f(x)f(x)f(x).

The GQVI. Given point-to-set mappings KKK and fff, GQVI(K,f)\mathrm{GQVI}(K,f)GQVI(K,f) asks for vectors xxx and yyy with

x∈K(x),y∈f(x),(x′−x)Ty≥0  for all x′∈K(x).x\in K(x),\qquad y\in f(x),\qquad (x'-x)^Ty\ge 0\ \text{ for all } x'\in K(x).x∈K(x),y∈f(x),(x′−x)Ty≥0  for all x′∈K(x).

Such a pair is a solution. For a point-to-point fff one takes y=f(x)y=f(x)y=f(x): find x∈K(x)x\in K(x)x∈K(x) with (x′−x)Tf(x)≥0(x'-x)^Tf(x)\ge0(x′−x)Tf(x)≥0 for all x′∈K(x)x'\in K(x)x′∈K(x).

Projection. For a set SSS and a point zzz, the projection PS(z)=sol⁡min⁡x∈S∥x−z∥P_S(z)=\operatorname{sol}\min_{x\in S}\|x-z\|PS​(z)=solminx∈S​∥x−z∥ is the nearest point of SSS to zzz. For nonempty closed convex SSS it exists and is unique.

Semicontinuity of point-to-set mappings (Berge). KKK is upper semicontinuous at xxx if for every open G⊇K(x)G\supseteq K(x)G⊇K(x) there is a neighbourhood NNN of xxx with K(x′)⊆GK(x')\subseteq GK(x′)⊆G for x′∈Nx'\in Nx′∈N; lower semicontinuous at xxx if for every open GGG meeting K(x)K(x)K(x) there is a neighbourhood NNN of xxx with K(x′)∩G≠∅K(x')\cap G\ne\emptysetK(x′)∩G=∅ for x′∈Nx'\in Nx′∈N; continuous if both. "On a set CCC" means at every point of CCC, with neighbourhoods relative to CCC.

Formalization targets

Goal: Theorem 5.2 (p. 220)

Let fff be continuous on a nonempty compact convex set CCC, and let KKK be a continuous mapping on CCC whose values K(x)K(x)K(x), x∈Cx\in Cx∈C, are nonempty, closed, convex and contained in CCC. Then there is xxx with

x∈K(x),(x′−x)Tf(x)≥0for all x′∈K(x).x\in K(x),\qquad (x'-x)^Tf(x)\ge 0\quad\text{for all }x'\in K(x).x∈K(x),(x′−x)Tf(x)≥0for all x′∈K(x).

Milestone: Lemma 5.1 (p. 220)

If KKK is continuous at x0x_0x0​ and every K(x)K(x)K(x) is nonempty, closed and convex, then for every y0y_0y0​ the map

(x,y)⟼p(x,y)=PK(x)(y)(x,y)\longmapsto p(x,y)=P_{K(x)}(y)(x,y)⟼p(x,y)=PK(x)​(y)

is continuous at (x0,y0)(x_0,y_0)(x0​,y0​).

Milestone: Theorem 5.1 (p. 220)

If every K(x)K(x)K(x) is closed and convex, then for every pair (x∗,y∗)(x^*,y^*)(x∗,y∗)

(x∗,y∗) solves GQVI(K,f)  ⟺  x∗=PK(x∗)(x∗−y∗) and y∗∈f(x∗).(x^*,y^*)\ \text{solves}\ \mathrm{GQVI}(K,f)\iff x^*=P_{K(x^*)}(x^*-y^*)\ \text{and}\ y^*\in f(x^*).(x∗,y∗) solves GQVI(K,f)⟺x∗=PK(x∗)​(x∗−y∗) and y∗∈f(x∗).

The Brouwer fixed point theorem is already on the platform (AGT.brouwer_fixed_point) and is included as a reference item, as is the Hilbert-space nearest-point theorem VectorSpaceOpt.min_distance_convex_set.

Significance

Theorem 5.2 is the existence theorem for quasi-variational inequalities with a moving convex constraint set and a continuous single-valued field, under compactness. With KKK constant it is the Hartman–Stampacchia theorem (Acta Math. 115 (1966) 271–310), the basic existence result for finite-dimensional variational inequalities, and so it also covers existence of equilibria of generalized Nash games whose shared constraints satisfy the continuity hypotheses. The paper notes that Theorem 5.2 also follows from its Corollary 3.1, which rests on the Eilenberg–Montgomery fixed point theorem; the projection route needs only Brouwer.

Theorem 5.1 matters beyond this existence result: it turns the GQVI into a fixed-point equation, which is the basis of projection algorithms for variational inequalities and of the contraction argument of the paper's Theorem 5.3. Lemma 5.1, continuity of the projection onto a continuously moving closed convex set, is a stability result used throughout parametric optimization.

All three statements were proved in 1982. None has a machine-checked proof on the platform or in Mathlib, which has neither a projection onto a general closed convex set as a function of the set nor any variational inequality. The work of this mission is to formalize the known proofs.

Difficulty

Theorem 5.1 is a direct consequence of the variational characterization of the nearest point of a convex set. The substance lies in Lemma 5.1 and in adapting it to the goal. The projection depends on the set K(x)K(x)K(x), not only on the point, and continuity of KKK is a statement about sets, given by two separate semicontinuity conditions that each control only one side of the convergence. Neither alone suffices: upper semicontinuity without lower lets K(x)K(x)K(x) shrink abruptly and the nearest point jump; lower without upper lets limits of nearest points fall outside K(x0)K(x_0)K(x0​). The limit points of the projections must also be kept bounded, which needs the nonemptiness near x0x_0x0​.

A second difficulty is that the goal assumes continuity of KKK only on CCC, with neighbourhoods relative to CCC, while Lemma 5.1 is stated for continuity at a point of Rn\mathbb R^nRn. Applying the lemma to the composite map x↦PK(x)(x−f(x))x\mapsto P_{K(x)}(x-f(x))x↦PK(x)​(x−f(x)) on CCC therefore requires either a relative version of the lemma or a reduction; the lemma cannot be quoted verbatim.

Formalization scope

The space is EuclideanSpace ℝ (Fin n) with its Euclidean norm, never the sup-norm space Fin n → ℝ. Point-to-set mappings are functions into Set. The solution predicate is IsGQVISolution K f x y; a point-to-point fff enters as fun z => {f z}. Upper and lower semicontinuity are Mathlib's UpperHemicontinuousAt/On and LowerHemicontinuousAt/On; "continuous on CCC" is both, relative to CCC.

The projection is IsProj S z p (nearest-point predicate) and proj S z, which returns a nearest point when one exists and the junk value zzz otherwise. Theorem 5.1 uses the relational form, so no junk value enters when K(x∗)=∅K(x^*)=\emptysetK(x∗)=∅. Lemma 5.1 assumes every K(x)K(x)K(x) nonempty, closed and convex, so proj is always the true projection there.

Two hypotheses implicit in the paper are explicit:

  1. Closed values in Theorem 5.2. The paper uses Berge's definitions, under which upper semicontinuous mappings have compact values, and its proof uses that each K(x)K(x)K(x) is closed. The Lean statement assumes K(x)K(x)K(x) closed for x∈Cx\in Cx∈C; without it the theorem is false (C=[0,1]C=[0,1]C=[0,1], K(x)≡(0,1)K(x)\equiv(0,1)K(x)≡(0,1), f≡1f\equiv1f≡1).
  2. Nonempty values in Lemma 5.1. The projection function p(x,y)=PK(x)(y)p(x,y)=P_{K(x)}(y)p(x,y)=PK(x)​(y) is defined only for nonempty K(x)K(x)K(x); the Lean statement assumes K(x)≠∅K(x)\ne\emptysetK(x)=∅ for all xxx.

A formalization in which the projection is merely "some point of K(x)K(x)K(x)", or ignores the distance, would make the reverse direction of Theorem 5.1 false and Lemma 5.1 meaningless; a GQVI whose test points range over CCC instead of K(x)K(x)K(x) would turn Theorem 5.2 into a plain variational inequality on CCC. Both are excluded by the definitions above.

A complete development needs the nearest-point characterization on closed convex sets (available in Mathlib and on the platform), sequential characterizations of upper and lower hemicontinuity for closed-valued mappings in Rn\mathbb R^nRn, continuity of the projection onto a moving convex set, and Brouwer's theorem (a platform reference). The hemicontinuity lemmas and the projection-continuity lemma are reusable for the other missions of this series and for parametric optimization in general. Proofs of Lemma 5.1 and Theorem 5.1, a relative-to-CCC version of Lemma 5.1, and a proof of Brouwer's theorem are all welcome.

Selected references

  • D. Chan and J. S. Pang, The generalized quasi-variational inequality problem, Mathematics of Operations Research 7(2) (1982) 211–222. https://doi.org/10.1287/moor.7.2.211
  • S. C. Fang and E. L. Peterson, Generalized variational inequalities, Mathematics Research Report No. 79-10, Department of Mathematics, University of Maryland Baltimore County, October 1979 (cited by Chan and Pang as [11]; no online copy).
  • P. Hartman and G. Stampacchia, On some non-linear elliptic differential-functional equations, Acta Mathematica 115 (1966) 271–310. https://doi.org/10.1007/BF02392210
  • C. Berge, Topological Spaces, The Macmillan Company, New York, 1963 (definitions of upper and lower semicontinuity of point-to-set mappings).
7 thms4 active usersReviewed
Control TheoryOperations ResearchOptimization·Captain: mikedeng1

Optimizing Static Linear Feedback: Gradient Method II: The Gradient Flow Stays in the Sublevel Set and Converges Exponentially under State FeedbackResearch Paper

Motivation

The linear-quadratic regulator (LQR) is the basic problem of optimal control: steer a linear system x˙=Ax+Bu\dot x = Ax + Bux˙=Ax+Bu so as to minimize an integrated quadratic cost of state and input. When the full state is measured, the optimal law is a static linear feedback u=−Kxu = -Kxu=−Kx obtained from an algebraic Riccati equation. When only an output y=Cxy = Cxy=Cx is measured, the optimal static output feedback u=−Kyu = -Kyu=−Ky has no closed form, and the problem is nonconvex. In both cases the cost can be written as a function f(K)f(K)f(K) of the gain alone, which makes it natural to minimize fff by gradient methods directly in the space of gains. This view goes back to Levine and Athans (1970) for output feedback and was revived in reinforcement learning by Fazel, Ge, Kakade and Mesbahi (2018), who proved global convergence of policy gradient for discrete-time state-feedback LQR.

Fatkhullin and Polyak (arXiv:2004.09875v2, SIAM J. Control Optim. 2021) carry out this program for the continuous-time problem. They show that fff is coercive, that it is LLL-smooth on every sublevel set, and that under state feedback it satisfies a gradient-domination (Łojasiewicz–Polyak) inequality. From these properties they derive convergence of the continuous gradient flow and of the discrete gradient method. This mission formalizes the continuous part, Theorem 4.1.

Setting

Fix real matrices A∈Rn×nA\in\mathbb R^{n\times n}A∈Rn×n, B∈Rn×mB\in\mathbb R^{n\times m}B∈Rn×m, C∈Rr×nC\in\mathbb R^{r\times n}C∈Rr×n and symmetric positive definite weights Q∈Rn×nQ\in\mathbb R^{n\times n}Q∈Rn×n, R∈Rm×mR\in\mathbb R^{m\times m}R∈Rm×m and covariance Σ∈Rn×n\Sigma\in\mathbb R^{n\times n}Σ∈Rn×n. A gain is K∈Rm×rK\in\mathbb R^{m\times r}K∈Rm×r, and the closed-loop matrix is AK=A−BKCA_K = A - BKCAK​=A−BKC. A square matrix is Hurwitz if all its eigenvalues have negative real part. The stabilizing set is

S={K:AK is Hurwitz}.\mathcal S = \{K : A_K \text{ is Hurwitz}\}.S={K:AK​ is Hurwitz}.

For K∈SK\in\mathcal SK∈S, let X(K)X(K)X(K) and Y(K)Y(K)Y(K) be the unique solutions of the Lyapunov equations

AK⊤X+XAK+C⊤K⊤RKC+Q=0,AKY+YAK⊤+Σ=0.A_K^\top X + XA_K + C^\top K^\top RKC + Q = 0,\qquad A_KY + YA_K^\top + \Sigma = 0 .AK⊤​X+XAK​+C⊤K⊤RKC+Q=0,AK​Y+YAK⊤​+Σ=0.

The LQR cost is f(K)=Tr(X(K)Σ)f(K) = \mathrm{Tr}(X(K)\Sigma)f(K)=Tr(X(K)Σ). It equals the expected infinite-horizon quadratic cost when the initial state has covariance Σ\SigmaΣ. Its gradient with respect to the Frobenius inner product ⟨M,N⟩=Tr(M⊤N)\langle M,N\rangle = \mathrm{Tr}(M^\top N)⟨M,N⟩=Tr(M⊤N) is

∇f(K)=2 (RKC−B⊤X(K)) Y(K) C⊤.\nabla f(K) = 2\,(RKC - B^\top X(K))\,Y(K)\,C^\top .∇f(K)=2(RKC−B⊤X(K))Y(K)C⊤.

Given a known stabilizing gain K0∈SK_0\in\mathcal SK0​∈S, the sublevel set is S0={K∈S:f(K)≤f(K0)}\mathcal S_0 = \{K\in\mathcal S : f(K)\le f(K_0)\}S0​={K∈S:f(K)≤f(K0​)}. The gradient flow is the ODE

K˙(t)=−∇f(K(t)),K(0)=K0.\dot K(t) = -\nabla f(K(t)),\qquad K(0) = K_0 .K˙(t)=−∇f(K(t)),K(0)=K0​.

State feedback (SLQR) is the case C=IC = IC=I; there fff is written fSf_SfS​, and K∗K_*K∗​ denotes a minimizer of fSf_SfS​ on S\mathcal SS. Norms: ∥⋅∥F\|\cdot\|_F∥⋅∥F​ is the Frobenius norm and ∥⋅∥\|\cdot\|∥⋅∥ the spectral norm. λ1(M)\lambda_1(M)λ1​(M) is the smallest eigenvalue of a symmetric MMM.

Formalization targets

Goal: Theorem 4.1 for state feedback

For C=IC=IC=I, let L>0L>0L>0 be a Lipschitz constant of ∇f\nabla f∇f on S0\mathcal S_0S0​ and let μ\muμ be the constant (3.11),

μ=λ1(R)λ12(Σ)λ1(Q)8fS(K∗)(∥A∥+∥B∥2fS(K0)/(λ1(Σ)λ1(R)))2.\mu = \frac{\lambda_1(R)\lambda_1^2(\Sigma)\lambda_1(Q)}{8f_S(K_*)\big(\|A\| + \|B\|^2 f_S(K_0)/(\lambda_1(\Sigma)\lambda_1(R))\big)^2}.μ=8fS​(K∗​)(∥A∥+∥B∥2fS​(K0​)/(λ1​(Σ)λ1​(R)))2λ1​(R)λ12​(Σ)λ1​(Q)​.

Then the flow has a solution on [0,∞)[0,\infty)[0,∞), and every solution stays in S0\mathcal S_0S0​, has f(Kt)f(K_t)f(Kt​) nonincreasing, has ∇f(Kt)→0\nabla f(K_t)\to0∇f(Kt​)→0 and min⁡0≤t≤T∥∇f(Kt)∥F2≤f(K0)/T\min_{0\le t\le T}\|\nabla f(K_t)\|_F^2\le f(K_0)/Tmin0≤t≤T​∥∇f(Kt​)∥F2​≤f(K0​)/T, and

∥Kt−K∗∥F≤2L(f(K0)−f(K∗))μ e−μt(t≥0).\|K_t - K_*\|_F \le \frac{\sqrt{2L(f(K_0)-f(K_*))}}{\mu}\,e^{-\mu t}\qquad(t\ge0).∥Kt​−K∗​∥F​≤μ2L(f(K0​)−f(K∗​))​​e−μt(t≥0).

Milestones

In attack order:

  1. Existence of a minimizer (Corollary 3.10).
  2. The gradient formula (Lemma 3.11).
  3. Existence of a Lipschitz constant of ∇f\nabla f∇f on S0\mathcal S_0S0​ (Theorem 3.15, qualitative).
  4. The gradient-domination inequality 12∥∇fS(K)∥F2≥μ(fS(K)−fS(K∗))\tfrac12\|\nabla f_S(K)\|_F^2\ge\mu(f_S(K)-f_S(K_*))21​∥∇fS​(K)∥F2​≥μ(fS​(K)−fS​(K∗​)) on S0\mathcal S_0S0​ (Theorem 3.17).
  5. The energy identity ddtf(Kt)=−∥∇f(Kt)∥F2\tfrac{d}{dt}f(K_t) = -\|\nabla f(K_t)\|_F^2dtd​f(Kt​)=−∥∇f(Kt​)∥F2​.
  6. The integral bound of Appendix D.1.
  7. The output-feedback part of Theorem 4.1 (general CCC with rank⁡C=r\operatorname{rank} C = rrankC=r): existence, invariance of S0\mathcal S_0S0​, monotonicity and (4.2).

Significance

The theorem certifies a simple, model-based procedure: start from any stabilizing gain and follow the negative gradient of the cost. The iterate never loses stability, and it converges exponentially to the optimal gain. The same happens for state feedback even though neither fff nor S\mathcal SS is convex. For output feedback it guarantees convergence to stationarity with an explicit O(1/T)O(1/T)O(1/T) rate. The continuous-time result is the template for the discrete gradient method of the same paper (Theorem 4.2) and for policy-gradient analyses of LQR in learning-based control.

The result is proved in the paper. The paper writes out the proof of (4.2) in Appendix D.1. It describes the whole proof as a replica of Theorems 8 and 9 of Polyak 1963, which treat functions satisfying the Łojasiewicz–Polyak inequality on the whole space. No machine-checked version of any of these statements is known. A formal proof would give the first verified treatment of LQR as an optimization problem over gains. It needs Lyapunov equations, the stabilizing set and the cost, together with the analytic facts on which the policy-gradient literature rests: coercivity, smoothness on sublevel sets, and gradient domination.

Difficulty

The obvious argument is the textbook convergence proof for gradient flows of smooth functions satisfying the Łojasiewicz–Polyak inequality. That proof assumes the function is defined and smooth on the whole space. Here fff lives only on the open set S\mathcal SS, blows up at its boundary, is unbounded on S\mathcal SS and is not globally LLL-smooth. The Łojasiewicz–Polyak inequality holds only on S0\mathcal S_0S0​, with a constant that depends on K0K_0K0​. The work therefore lies in keeping the trajectory inside S0\mathcal S_0S0​ and showing it exists for all time. This requires compactness of S0\mathcal S_0S0​ (coercivity of fff) and a positive distance from S0\mathcal S_0S0​ to the boundary of S\mathcal SS. Local ODE existence alone gives neither. The explicit constant μ\muμ additionally requires lower bounds on solutions of Lyapunov equations and an upper bound on ∥K∥F\|K\|_F∥K∥F​ over S0\mathcal S_0S0​.

Formalization scope

Matrices are Matrix (Fin p) (Fin q) ℝ. Hurwitz means every complex eigenvalue of the complexified matrix has negative real part. X(K)X(K)X(K) and Y(K)Y(K)Y(K) are the unique solutions of their Lyapunov equations. Where the solution is not unique (possible only off S\mathcal SS) they take the value 000, and no statement uses these off-S\mathcal SS values. ∇f\nabla f∇f is defined by formula (3.3), and Lemma 3.11 states that it is the Fréchet derivative with respect to the Frobenius inner product. A solution of the flow is a curve with K(0)=K0K(0)=K_0K(0)=K0​ that stays in S\mathcal SS for t≥0t\ge0t≥0. Its entries have the prescribed derivative within [0,∞)[0,\infty)[0,∞). Global existence and invariance of S0\mathcal S_0S0​ are conclusions, never hypotheses. Assuming a global solution, or a solution confined to S0\mathcal S_0S0​, would trivialize the theorem, and that encoding is excluded. The case C=IC=IC=I is a matrix argument CCC with C=1C=1C=1. λ1\lambda_1λ1​ is the minimum of the (unsorted) eigenvalues, and the spectral norm is λmax⁡(M⊤M)\sqrt{\lambda_{\max}(M^\top M)}λmax​(M⊤M)​. "Monotone decreasing" is rendered as nonincreasing. min⁡0≤t≤T\min_{0\le t\le T}min0≤t≤T​ is rendered as the existence of a point of [0,T][0,T][0,T] where the bound holds.

The standing assumptions of p. 3 are hypotheses wherever they apply: K0∈SK_0\in\mathcal SK0​∈S, Q,R,Σ≻0Q,R,\Sigma\succ0Q,R,Σ≻0, rank⁡C=r\operatorname{rank}C=rrankC=r, and B≠0B\ne0B=0. Deviations from the printed paper:

  • The paper's explicit Lipschitz constant (3.8) is false as printed; the planning notes record counterexamples for both output and state feedback. The goal therefore takes LLL as any Lipschitz constant of ∇f\nabla f∇f on S0\mathcal S_0S0​, which is the paper's own definition of LLL-smoothness (§3.6). Theorem 3.15 enters only in its qualitative form, as the existence of such an LLL.
  • The set-builder for S\mathcal SS on p. 3 writes Rm×n\mathbb R^{m\times n}Rm×n; gains are m×rm\times rm×r.
  • The optimal gain K∗K_*K∗​ is a hypothesis (its existence is Corollary 3.10), and f(K∗)>0f(K_*)>0f(K∗​)>0 is not assumed.

A complete development needs the following: Lyapunov equations and their solution theory (uniqueness, positivity, integral representation), continuity and differentiability of K↦X(K)K\mapsto X(K)K↦X(K) on S\mathcal SS, coercivity of fff, global existence for ODEs confined to a compact invariant set, and the Łojasiewicz–Polyak argument for flows on a subset. The Lyapunov and stabilizing-set layer is reusable across control missions. Proofs of any milestone, and of auxiliary lemmas such as Lemmas 3.8, A.5, C.1–C.3, are welcome.

Selected references

  • I. Fatkhullin, B. Polyak, Optimizing Static Linear Feedback: Gradient Method, SIAM J. Control Optim. 59 (2021); preprint arXiv:2004.09875v2. https://arxiv.org/abs/2004.09875
  • M. Fazel, R. Ge, S. Kakade, M. Mesbahi, Global Convergence of Policy Gradient Methods for the Linear Quadratic Regulator, ICML 2018. https://arxiv.org/abs/1801.05039
  • W. S. Levine, M. Athans, On the determination of the optimal constant output feedback gains for linear multivariable systems, IEEE Trans. Automat. Control 15 (1970). https://doi.org/10.1109/TAC.1970.1099363
  • H. Karimi, J. Nutini, M. Schmidt, Linear Convergence of Gradient and Proximal-Gradient Methods Under the Polyak–Łojasiewicz Condition, ECML PKDD 2016. https://arxiv.org/abs/1608.04636
  • B. T. Polyak, Gradient methods for the minimisation of functionals, USSR Comput. Math. Math. Phys. 3 (1963), 864–878. https://doi.org/10.1016/0041-5553(63)90382-3
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Algorithmic Game TheoryMechanism DesignOperations Research+1·Captain: mikedeng1

Bargaining under Incomplete Information I: Class A Equilibrium Offer Strategies Satisfy the Linked Differential EquationsResearch Paper

Motivation

A buyer and a seller negotiate over a single indivisible good. Each knows how much the good is worth to them, but not how much it is worth to the other side. Whether the two will trade, and at what price, then depends on how each party shades its offer to exploit the other's uncertainty. Chatterjee and Samuelson (Bargaining under Incomplete Information, Operations Research 31(5), 1983) modelled this situation as a one-shot game in which both parties submit sealed offers simultaneously, and characterised its Bayesian equilibria.

The model became the standard reference point for bilateral trade with two-sided private information. Myerson and Satterthwaite (J. Econ. Theory 29, 1983) showed that no mechanism can guarantee efficient trade in this setting, and that the equilibrium of the Chatterjee–Samuelson game with k=1/2k = 1/2k=1/2 and uniform values attains the second-best efficiency bound. Later work on the kkk-double auction (Satterthwaite and Williams, J. Econ. Theory 48, 1989; Leininger, Linhart and Radner, J. Econ. Theory 48, 1989) studies the continuum of equilibria of exactly this game. The object of the present mission, a pair of linked differential equations, is the tool these papers use to construct and classify equilibria.

Setting

A seller has reservation price vs∈[v‾s,vˉs]v_s \in [\underline v_s, \bar v_s]vs​∈[v​s​,vˉs​] and a buyer has reservation price vb∈[v‾b,vˉb]v_b \in [\underline v_b, \bar v_b]vb​∈[v​b​,vˉb​]. Each knows their own value. The buyer's belief about vsv_svs​ is a probability measure μb\mu_bμb​ with distribution function FbF_bFb​; the seller's belief about vbv_bvb​ is μs\mu_sμs​ with distribution function FsF_sFs​. The subscript names the player who holds the belief, not the variable. Each belief is regular: F(v‾)=0F(\underline v) = 0F(v​)=0, F(vˉ)=1F(\bar v) = 1F(vˉ)=1, and FFF is strictly increasing and differentiable on the value interval, with density fbf_bfb​ (respectively fsf_sfs​).

Under the Bargaining Rule, the seller asks sss and the buyer offers bbb simultaneously. If b≥sb \ge sb≥s the good is sold at P=kb+(1−k)sP = kb + (1-k)sP=kb+(1−k)s for a fixed k∈[0,1]k \in [0, 1]k∈[0,1]; otherwise nothing happens. Profits are P−vsP - v_sP−vs​ for the seller and vb−Pv_b - Pvb​−P for the buyer on trade, and zero otherwise.

An offer strategy is a function SSS (for the seller) or BBB (for the buyer) from values to offers. Against SSS, a buyer with value vvv offering bbb earns in expectation

πb(b,v)=∫1{S(vs)≤b} (v−kb−(1−k)S(vs)) dμb(vs),\pi_b(b, v) = \int \mathbf 1\{S(v_s) \le b\}\,\bigl(v - kb - (1-k)S(v_s)\bigr)\,d\mu_b(v_s),πb​(b,v)=∫1{S(vs​)≤b}(v−kb−(1−k)S(vs​))dμb​(vs​),

and symmetrically πs(s,v)=∫1{s≤B(vb)} (kB(vb)+(1−k)s−v) dμs(vb)\pi_s(s, v) = \int \mathbf 1\{s \le B(v_b)\}\,(kB(v_b) + (1-k)s - v)\,d\mu_s(v_b)πs​(s,v)=∫1{s≤B(vb​)}(kB(vb​)+(1−k)s−v)dμs​(vb​). The pair (S,B)(S, B)(S,B) is an equilibrium if B(v)B(v)B(v) maximises πb(⋅,v)\pi_b(\cdot, v)πb​(⋅,v) over all real offers for every buyer value vvv, and S(v)S(v)S(v) maximises πs(⋅,v)\pi_s(\cdot, v)πs​(⋅,v) for every seller value vvv.

A strategy is of class AAA if its offers are bounded, it is nondecreasing, it is strictly increasing except where it sits at its lowest offer mmm or its highest offer MMM, and it is differentiable wherever its offer lies strictly between mmm and MMM. A class AAA equilibrium is an equilibrium in which both strategies are of class AAA.

Formalization targets

Goal: Theorem 2, the linked differential equations

In a class AAA equilibrium, wherever the seller's strategy is strictly increasing around yyy and the buyer value xxx offers B(x)=S(y)B(x) = S(y)B(x)=S(y),

kFb(y)S′(y)+fb(y)S(y)=x fb(y),(3a)k F_b(y) S'(y) + f_b(y) S(y) = x\, f_b(y), \tag{3a}kFb​(y)S′(y)+fb​(y)S(y)=xfb​(y),(3a)

and wherever the buyer's strategy is strictly increasing around xxx and the seller value yyy asks S(y)=B(x)S(y) = B(x)S(y)=B(x),

(1−k)(1−Fs(x))B′(x)−fs(x)B(x)=− y fs(x).(3b)(1-k)\bigl(1 - F_s(x)\bigr) B'(x) - f_s(x) B(x) = -\,y\, f_s(x). \tag{3b}(1−k)(1−Fs​(x))B′(x)−fs​(x)B(x)=−yfs​(x).(3b)

The paper writes x=B−1(S(y))x = B^{-1}(S(y))x=B−1(S(y)) in (3a) and y=S−1(B(x))y = S^{-1}(B(x))y=S−1(B(x)) in (3b).

Milestones: the displays of the proof

  1. Gb(S(y))=Fb(y)G_b(S(y)) = F_b(y)Gb​(S(y))=Fb​(y): the buyer's probability that the seller asks at most S(y)S(y)S(y) equals Fb(y)F_b(y)Fb​(y).
  2. The buyer's first-order condition: ∂πb/∂b=(v−b)gb(b)−kGb(b)\partial \pi_b / \partial b = (v - b) g_b(b) - k G_b(b)∂πb​/∂b=(v−b)gb​(b)−kGb​(b) at b=S(y)b = S(y)b=S(y), with offer density gb(S(y))=fb(y)/S′(y)g_b(S(y)) = f_b(y)/S'(y)gb​(S(y))=fb​(y)/S′(y), and it vanishes at an equilibrium offer.
  3. The seller's first-order condition: ∂πs/∂s=(v−s)gs(s)+(1−k)(1−Gs(s))\partial \pi_s / \partial s = (v - s) g_s(s) + (1-k)(1 - G_s(s))∂πs​/∂s=(v−s)gs​(s)+(1−k)(1−Gs​(s)) at s=B(x)s = B(x)s=B(x), and it vanishes at an equilibrium ask.

The milestones assume S′(y)>0S'(y) > 0S′(y)>0 (respectively B′(x)>0B'(x) > 0B′(x)>0), which the paper's formula for the offer density needs. The goal does not assume it.

Significance

Theorem 2 reduces the search for equilibria to the analysis of a pair of ordinary differential equations. Every explicit equilibrium in the paper and in the later kkk-double-auction literature is found as a solution of (3a)–(3b) with suitable boundary conditions: the linear equilibrium for uniform beliefs (the paper's Example 1), the one-parameter families of Satterthwaite–Williams, and the non-linear equilibria of Leininger–Linhart–Radner. The equations also expose how the split parameter kkk distributes bargaining power: at k=1k = 1k=1 equation (3b) forces the seller to ask their own value, and at k=0k = 0k=0 equation (3a) forces the buyer to bid theirs.

The result is proved in the paper. To the best of a search of the platform, no formalization of it or of the bargaining model exists. This mission produces a machine-checked version of the necessary conditions. Its definitions of beliefs, expected profits, equilibrium and class AAA are also the basis for companion missions on the uniform linear equilibrium and its trade probability.

Difficulty

The paper's proof is four lines: differentiate the expected profit, set the derivative to zero, substitute. Three steps of that argument do not survive a careful reading.

First, the paper differentiates under an offer density gbg_bgb​ that exists only if SSS is strictly increasing and has a positive derivative. Class AAA allows SSS to be flat at its bounds, to jump between them, and to have zero derivative. The formal goal assumes none of this. It must handle the case S′(y)=0S'(y) = 0S′(y)=0, where the offer distribution has an infinite density at S(y)S(y)S(y) and the first-order condition becomes a one-sided argument.

Second, identifying Gb(S(y))G_b(S(y))Gb​(S(y)) with Fb(y)F_b(y)Fb​(y) requires that no seller value outside a neighbourhood of yyy makes the same offer. That is a global statement about SSS, and it is where monotonicity on the whole interval and the "flat only at the bounds" clause of class AAA enter.

Third, the first-order condition needs the equilibrium offer S(y)S(y)S(y) to be an interior maximiser of a function of bbb that is differentiable there. The profit πb\pi_bπb​ is an integral over the belief, and its differentiability at S(y)S(y)S(y) must be derived from the differentiability of SSS at the single point yyy and of FbF_bFb​. Neither SSS nor πb\pi_bπb​ is assumed continuous elsewhere.

Formalization scope

Values, offers and kkk are real numbers. Beliefs are probability measures on R\mathbb RR, with distribution function Mathlib's ProbabilityTheory.cdf. Expected profits are Bochner integrals over the opponent's value, not over an offer density. The two agree whenever the density exists, and the integral form needs none. Integrability is not assumed: for a class AAA strategy and a regular belief supported on the value interval, the integrand is bounded and almost everywhere measurable. Ties (b=sb = sb=s) trade. Deviations range over all real offers. Strategies are arbitrary functions R→R\mathbb R \to \mathbb RR→R whose values outside the value interval play no role.

The derivative S′(y)S'(y)S′(y) is deriv S y. The paper's inverses B−1B^{-1}B−1 and S−1S^{-1}S−1 are not introduced as functions. The matching value is a universally quantified variable xxx with B(x)=S(y)B(x) = S(y)B(x)=S(y), so no junk value of an inverse can make an equation true or false. The equations are asserted only at values yyy interior to an open subinterval on which SSS is strictly increasing. A formalization that assumed the first-order condition, or restricted to strategies with S′>0S' > 0S′>0 everywhere, would be a different and weaker theorem.

A complete development needs: differentiation of parametric integrals of indicator type (the derivative of b↦∫1{S≤b} h dμb \mapsto \int \mathbf 1\{S \le b\}\,h\,d\mub↦∫1{S≤b}hdμ), the change of variables from values to offers under a strictly increasing strategy, and Fermat's rule (IsLocalMax.hasDerivAt_eq_zero). The first two are reusable for auctions and other Bayesian games with monotone strategies. Proofs of the milestones, alternative proofs of the goal, and general lemmas about monotone strategies are welcome.

Selected references

  • K. Chatterjee and W. Samuelson, Bargaining under Incomplete Information, Operations Research 31(5):835–851, 1983. https://doi.org/10.1287/opre.31.5.835
  • R. B. Myerson and M. A. Satterthwaite, Efficient Mechanisms for Bilateral Trading, Journal of Economic Theory 29(2):265–281, 1983. https://doi.org/10.1016/0022-0531(83)90048-0
  • M. A. Satterthwaite and S. R. Williams, Bilateral Trade with the Sealed Bid k-Double Auction: Existence and Efficiency, Journal of Economic Theory 48(1):107–133, 1989. https://doi.org/10.1016/0022-0531(89)90120-8
  • W. Leininger, P. B. Linhart and R. Radner, Equilibria of the Sealed-Bid Mechanism for Bargaining with Incomplete Information, Journal of Economic Theory 48(1):63–106, 1989. https://doi.org/10.1016/0022-0531(89)90121-X
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Convex OptimizationOperations ResearchOptimization·Captain: mikedeng1

Optimizing Static Linear Feedback: Gradient Method III: Gradient Descent with the Hessian Step Size Converges Linearly on Strongly Convex FunctionsResearch Paper

Motivation

Gradient descent needs a step size, and the classical choices each ask for something the user may not have. A constant step 1/L1/L1/L needs the Lipschitz constant LLL of the gradient, which is rarely known and often pessimistic. Backtracking needs repeated function evaluations. The exact line search needs a one-dimensional minimization at every iteration. Fatkhullin and Polyak (arXiv:2004.09875v2, SIAM J. Control Optim. 2021, doi:10.1137/20M1329858) proposed a step size for the static linear-quadratic regulator (their rule (4.8), §4.3, p. 11). In §6.1 they point out that the same rule applies to any smooth unconstrained problem min⁡x∈Rnf(x)\min_{x\in\mathbb{R}^n} f(x)minx∈Rn​f(x). The rule divides the squared gradient norm by the Hessian quadratic form along the gradient. It needs one Hessian–vector product per iteration and neither LLL nor the strong convexity constant μ\muμ. In the paper's LQR experiment (§5, Figure 8, p. 13) the algorithm built on this step converges much faster than gradient descent with a constant step tuned at the first iterations.

The paper proves the method converges linearly for strongly convex functions (Theorem 6.1, p. 13). The proof takes one page (Appendix D.4, p. 19). This mission formalizes that theorem. It is the third mission of a series on this paper; the other two concern the LQR gradient method and gradient flow, and this one uses none of their control-theoretic objects.

Setting

Let f:Rn→Rf:\mathbb{R}^n\to\mathbb{R}f:Rn→R be twice differentiable, with gradient ∇f(x)\nabla f(x)∇f(x) and Hessian ∇2f(x)\nabla^2 f(x)∇2f(x). Three constants describe it.

  • fff is μ\muμ-strongly convex, μ>0\mu>0μ>0: f(ax+by)≤af(x)+bf(y)−ab μ2∥x−y∥2f(ax+by)\le af(x)+bf(y)-ab\,\frac{\mu}{2}\|x-y\|^2f(ax+by)≤af(x)+bf(y)−ab2μ​∥x−y∥2 for all x,yx,yx,y and a,b≥0a,b\ge0a,b≥0 with a+b=1a+b=1a+b=1.
  • ∇f\nabla f∇f is Lipschitz with constant LLL: ∥∇f(x)−∇f(y)∥≤L∥x−y∥\|\nabla f(x)-\nabla f(y)\|\le L\|x-y\|∥∇f(x)−∇f(y)∥≤L∥x−y∥.
  • ∇2f\nabla^2 f∇2f is Lipschitz with constant MMM: ∥∇2f(x)−∇2f(y)∥≤M∥x−y∥\|\nabla^2 f(x)-\nabla^2 f(y)\|\le M\|x-y\|∥∇2f(x)−∇2f(y)∥≤M∥x−y∥ in the operator norm.

Let x∗x_*x∗​ be the global minimizer of fff. The Hessian step size at a point xxx is

γ(x)=∥∇f(x)∥2⟨∇2f(x)∇f(x),∇f(x)⟩,\gamma(x)=\frac{\|\nabla f(x)\|^2}{\langle\nabla^2 f(x)\nabla f(x),\nabla f(x)\rangle},γ(x)=⟨∇2f(x)∇f(x),∇f(x)⟩∥∇f(x)∥2​,

the minimizer of the second-order Taylor model of fff along −∇f(x)-\nabla f(x)−∇f(x). The method (6.1) runs

xj+1=xj−γj∇f(xj),γj=γ(xj),x_{j+1}=x_j-\gamma_j\nabla f(x_j),\qquad\gamma_j=\gamma(x_j),xj+1​=xj​−γj​∇f(xj​),γj​=γ(xj​),

from a starting point x0x_0x0​. The damped method with factor σ>0\sigma>0σ>0 runs xj+1=xj−σγj∇f(xj)x_{j+1}=x_j-\sigma\gamma_j\nabla f(x_j)xj+1​=xj​−σγj​∇f(xj​). For a quadratic f(x)=⟨Hx,x⟩f(x)=\langle Hx,x\ranglef(x)=⟨Hx,x⟩ the method (6.1) is steepest descent with exact line search.

Formalization targets

Goal: Theorem 6.1 (p. 13), both parts

Under the hypotheses above:

  1. If δ>0\delta>0δ>0 and M2L(f(x0)−f(x∗))≤3μ2(1−δ)M\sqrt{2L(f(x_0)-f(x_*))}\le3\mu^2(1-\delta)M2L(f(x0​)−f(x∗​))​≤3μ2(1−δ) (condition (6.2)), the iterates of (6.1) satisfy
f(xj)−f(x∗)≤(f(x0)−f(x∗))(1−μδL)jfor all j.(6.3)f(x_j)-f(x_*)\le\bigl(f(x_0)-f(x_*)\bigr)\Bigl(1-\frac{\mu\delta}{L}\Bigr)^j\quad\text{for all }j.\tag{6.3}f(xj​)−f(x∗​)≤(f(x0​)−f(x∗​))(1−Lμδ​)jfor all j.(6.3)
  1. If 0<σ≤μ/L0<\sigma\le\mu/L0<σ≤μ/L, the damped iterates from any x0x_0x0​ satisfy
f(xj)−f(x∗)≤(f(x0)−f(x∗))(1−μσL)jfor all j.(6.4)f(x_j)-f(x_*)\le\bigl(f(x_0)-f(x_*)\bigr)\Bigl(1-\frac{\mu\sigma}{L}\Bigr)^j\quad\text{for all }j.\tag{6.4}f(xj​)−f(x∗​)≤(f(x0​)−f(x∗​))(1−Lμσ​)jfor all j.(6.4)

The constants are the paper's, stated exactly.

Milestones (Appendix D.4, p. 19)

  • Cubic Taylor bound (first display): ∣f(x+y)−f(x)−⟨∇f(x),y⟩−12⟨∇2f(x)y,y⟩∣≤M6∥y∥3\bigl|f(x+y)-f(x)-\langle\nabla f(x),y\rangle-\frac12\langle\nabla^2 f(x)y,y\rangle\bigr|\le\frac M6\|y\|^3​f(x+y)−f(x)−⟨∇f(x),y⟩−21​⟨∇2f(x)y,y⟩​≤6M​∥y∥3.
  • One-step inequality (third display): with φj=f(xj)\varphi_j=f(x_j)φj​=f(xj​), φj+1≤φj−12γj∥∇f(xj)∥2(1−Mγj23∥∇f(xj)∥)\varphi_{j+1}\le\varphi_j-\frac12\gamma_j\|\nabla f(x_j)\|^2\bigl(1-\frac{M\gamma_j^2}{3}\|\nabla f(x_j)\|\bigr)φj+1​≤φj​−21​γj​∥∇f(xj​)∥2(1−3Mγj2​​∥∇f(xj​)∥).
  • (D.1): f(y)≤f(x)+⟨∇f(x),y−x⟩+L2μ⟨∇2f(x)(y−x),y−x⟩f(y)\le f(x)+\langle\nabla f(x),y-x\rangle+\frac{L}{2\mu}\langle\nabla^2 f(x)(y-x),y-x\ranglef(y)≤f(x)+⟨∇f(x),y−x⟩+2μL​⟨∇2f(x)(y−x),y−x⟩.
  • (D.2): one damped step gives f(xj+1)≤f(xj)−σγj2∥∇f(xj)∥2f(x_{j+1})\le f(x_j)-\frac{\sigma\gamma_j}{2}\|\nabla f(x_j)\|^2f(xj+1​)≤f(xj​)−2σγj​​∥∇f(xj​)∥2.

Significance

Theorem 6.1 gives a rate for a step size computed from local second-order information alone. Part 1 says that near the minimizer the method converges at least as fast as gradient descent with step δ/L\delta/Lδ/L, with no step-size parameter to tune. Part 2 gives convergence from every starting point, at the price of knowing a lower bound on μ/L\mu/Lμ/L for the damping. The same step appears in the paper's LQR method (rule (4.8)) and in gradient projection methods (p. 13, citing [37]), so the one-step inequalities are reusable beyond this theorem.

The result is proved in the paper. As of this writing none of it has a machine-checked proof. The formal work is the full development: the cubic Taylor bound from a Lipschitz second derivative on Rn\mathbb{R}^nRn, the two one-step inequalities, and the inductions that give the rates.

Difficulty

The obvious argument for gradient descent uses the quadratic upper bound f(y)≤f(x)+⟨∇f(x),y−x⟩+L2∥y−x∥2f(y)\le f(x)+\langle\nabla f(x),y-x\rangle+\frac L2\|y-x\|^2f(y)≤f(x)+⟨∇f(x),y−x⟩+2L​∥y−x∥2 and a step no larger than 2/L2/L2/L. The Hessian step can be as large as 1/μ1/\mu1/μ, far outside that range, so the quadratic bound in the Euclidean norm gives no decrease. Two different replacements are needed. For the undamped method, the cubic Taylor error must be controlled along the whole trajectory, and condition (6.2) is imposed only on x0x_0x0​: the proof must show the gradient stays small enough at every later iterate. For the damped method, the upper bound must be measured in the local Hessian norm (D.1), which trades the step's size for the condition number L/μL/\muL/μ.

On the Lean side, Mathlib has Taylor's theorem in one variable. The cubic bound for a function on Rn\mathbb{R}^nRn with a Lipschitz Fréchet second derivative must be assembled from it or from the integral form along a segment. Mathlib has no ready-made link between strong convexity and a lower bound on the Hessian either.

Formalization scope

The space is EuclideanSpace ℝ (Fin n). The gradient is Mathlib's gradient f. The Hessian quadratic form ⟨∇2f(x)v,v⟩\langle\nabla^2 f(x)v,v\rangle⟨∇2f(x)v,v⟩ is fderiv ℝ (fderiv ℝ f) x v v. Twice differentiability is differentiability of f and of fderiv ℝ f everywhere. The Lipschitz constant of the Hessian is in the operator norm of the bilinear map, not the Frobenius norm. Strong convexity is StrongConvexOn Set.univ μ f with 0 < μ; Mathlib's modulus is μ2∥x−y∥2\frac\mu2\|x-y\|^22μ​∥x−y∥2. LLL and MMM are real constants in the Lipschitz inequalities. The minimizer x∗x_*x∗​ is a hypothesis (f(x∗)≤f(y)f(x_*)\le f(y)f(x∗​)≤f(y) for all yyy), not constructed.

Deviations from the page, all recorded in the items' Formalization Notes:

  • The damping positivity 0<σ0<\sigma0<σ is added. It is implicit on the page.
  • The damped claim is stated under the full hypotheses of Theorem 6.1, including the Lipschitz Hessian, although its proof does not use MMM.
  • The one-step inequality for (6.1) is stated under the strong convexity of Theorem 6.1, which keeps γ≥0\gamma\ge0γ≥0. The gradient's Lipschitz constant is not assumed there.

At a stationary point the step is 0/00/00/0; Lean evaluates it to 000, so the method stays at the minimizer, and both rates remain true.

The iterates are those of the defined recursions (6.1) and its damped version. A statement about an arbitrary sequence satisfying a descent inequality would be a different, weaker theorem and does not discharge the goal. Condition (6.2) is imposed on x0x_0x0​ only; a version assuming it at every iterate is also not the goal.

Contributions welcome: the multivariate cubic Taylor bound (reusable wherever a Lipschitz Hessian appears, e.g. in cubic regularization of Newton's method); the Hessian bounds μI⪯∇2f⪯LI\mu I\preceq\nabla^2 f\preceq LIμI⪯∇2f⪯LI from strong convexity and a Lipschitz gradient; and the inequality 12∥∇f(x)∥2≤L(f(x)−f(x∗))\frac12\|\nabla f(x)\|^2\le L(f(x)-f(x_*))21​∥∇f(x)∥2≤L(f(x)−f(x∗​)).

Selected references

  • I. Fatkhullin, B. Polyak, Optimizing Static Linear Feedback: Gradient Method, arXiv:2004.09875v2, 2020; SIAM J. Control Optim. 59(5), 2021. https://arxiv.org/abs/2004.09875 · https://doi.org/10.1137/20M1329858
  • Yu. Nesterov, B. T. Polyak, Cubic regularization of Newton method and its global performance, Math. Program. 108, 2006 (the cubic Taylor bound for Lipschitz Hessians). https://doi.org/10.1007/s10107-006-0706-8
  • B. T. Polyak, Introduction to Optimization, Optimization Software, 1987 (gradient methods, strong convexity).
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CombinatoricsOperations ResearchOptimization·Captain: mikedeng1

Branch-and-Price-and-Cut for the Split-Delivery Vehicle Routing Problem with Time Windows: Some Optimal Solution Traverses Each Pair of Reverse Customer Arcs at Most OnceResearch Paper

Motivation

Vehicle routing problems ask for minimum-cost vehicle routes that deliver goods from a depot to a set of customers. In the split-delivery vehicle routing problem with time windows (SDVRPTW) a customer's demand may be served by several vehicles, and each customer must be visited inside a prescribed time window. Allowing split deliveries matters in practice: for the variant without time windows, Dror and Trudeau (1989) showed empirically that splitting can save substantially, and Archetti, Savelsbergh and Speranza (2006) proved the savings can reach 50%.

Exact methods for the SDVRPTW are branch-and-price algorithms, and they rely on structural properties of optimal solutions to prune the search. Desaulniers (Operations Research 58(1), 2010) collects these properties in §2 of his paper and uses the strongest one, Corollary 2, as a family of valid inequalities (constraint (7)) in his branch-and-price-and-cut method.

Timeline (as reported by Desaulniers 2010, §§1–2).

  • 1989–1990. Dror and Trudeau prove, for the SDVRP without time windows and with the triangle inequality, that some optimal solution has no two routes sharing more than one split customer.
  • 2006. Gendreau, Dejax, Feillet and Gueguen observe that the property holds with time windows, derive the arc-based Corollary 1, and remark that elementary routes suffice (Remark 1).
  • 2010. Desaulniers strengthens Corollary 1 to pairs of reverse arcs (Corollary 2) and exploits it as cutting planes.

Setting

An instance has nnn customers N\mathcal NN, a start depot 000 and an end depot n+1n+1n+1 (the same location at the beginning and end of the planning horizon), and the following data: a vehicle capacity Q>0Q > 0Q>0; a demand di>0d_i > 0di​>0 for each customer, which may exceed QQQ; a time window [ev,lv][e_v, l_v][ev​,lv​] for each node, shared by the two depot copies; nonnegative travel times tvwt_{vw}tvw​, which include the service time at vvv; and nonnegative costs cvwc_{vw}cvw​. The arc set A\mathcal AA contains the idle arc (0,n+1)(0, n+1)(0,n+1) and every arc (v,w)(v, w)(v,w), v≠wv \ne wv=w, with ev+tvw≤lwe_v + t_{vw} \le l_wev​+tvw​≤lw​. The triangle inequality tvx≤tvw+twxt_{vx} \le t_{vw} + t_{wx}tvx​≤tvw​+twx​, cvx≤cvw+cwxc_{vx} \le c_{vw} + c_{wx}cvx​≤cvw​+cwx​ is assumed throughout.

A route is a walk 0→v1→⋯→vm→n+10 \to v_1 \to \dots \to v_m \to n+10→v1​→⋯→vm​→n+1 along arcs of A\mathcal AA, customers possibly repeated, with service start times inside the time windows that respect travel times (waiting is allowed), and nonnegative quantities delivered at its visits whose total is at most QQQ. Its cost is the sum of its arc costs. A solution is a finite family of routes, one per vehicle, with no bound on their number; it is feasible if every customer iii receives in total at least did_idi​, and optimal if it is feasible and no feasible solution costs less. For customers i,ji, ji,j, let xijx_{ij}xij​ be the number of times arc (i,j)(i, j)(i,j) is traversed, summed over all routes of a solution, and let A(N)=A∩(N×N)\mathcal A(\mathcal N) = \mathcal A \cap (\mathcal N \times \mathcal N)A(N)=A∩(N×N).

Formalization targets

All four statements assume the triangle inequality and that the instance has a feasible solution, and assert the existence of an optimal solution with a structural property.

Goal: Corollary 2 (p. 181)

∃ optimal solution with xij+xji≤1for all (i,j)∈A(N).\exists \text{ optimal solution with } x_{ij} + x_{ji} \le 1 \quad \text{for all } (i,j) \in \mathcal A(\mathcal N).∃ optimal solution with xij​+xji​≤1for all (i,j)∈A(N).

The two arcs of a pair of reverse customer arcs are used at most once in total. This is the form constraint (7) of the paper gives to the corollary.

Milestones

  1. Remark 1. Some optimal solution has only elementary routes: no route visits a customer twice.
  2. Theorem 1. Some optimal solution has no two distinct routes with two customers in common.
  3. Corollary 1. Some optimal solution has xij≤1x_{ij} \le 1xij​≤1 for all (i,j)∈A(N)(i, j) \in \mathcal A(\mathcal N)(i,j)∈A(N).

Significance

The result. Corollary 2 turns a property of optimal solutions into linear inequalities on arc-flow variables. Adding them to the arc-flow formulation cuts off fractional points of its linear relaxation while keeping an optimal integer solution, which is how Desaulniers uses them. Remark 1 justifies pricing only elementary routes in column generation. Theorem 1 is the combinatorial fact underneath both corollaries and is reused throughout the split-delivery literature.

Formalizing it. The four results are proved in the literature (Dror–Trudeau; Gendreau et al. 2006); Desaulniers states them without proof. No machine-checked version exists. This mission produces a reusable Lean model of the SDVRPTW (instances, arc sets, feasible routes with schedules and delivery patterns, solutions, optimality) and checked proofs of these properties, including the existence of an optimal solution, which the paper takes for granted.

Difficulty

The obvious argument is local: take an optimal solution that violates the property, shift quantities between two routes, remove a visit, and shortcut. Three points make this less routine than it sounds. First, the statements are existential: each exchange must keep the solution optimal and not reintroduce a violation already removed, so one needs a termination measure that decreases under every exchange (Corollary 2 needs elementarity and the Theorem 1 property simultaneously, not two separate optimal solutions). Second, removing a visit is feasible only because the arc set is defined by time windows: the shortcut arc (v,w)(v, w)(v,w) must be shown to exist from the schedule and the triangle inequality on travel times, and the new schedule must be built explicitly. Third, the feasible set is infinite (real quantities, unbounded walks, unbounded number of vehicles), so the existence of an optimal solution is itself a statement to prove, not a hypothesis.

Formalization scope

Namespace SplitDeliveryVRPTW.Known. Nodes are the inductive type Node n (start, cust i for i : Fin n, finish). All quantities, times and costs are real. The arc set is exactly the set the paper defines (read as "if and only if"), with arcs into the start depot and out of the end depot excluded. The triangle inequality for ttt is imposed on pairwise distinct nodes and for ccc on triples of arcs, where the paper's data is defined. A route is a customer list (repetitions allowed) with a time function over path positions and a quantity function over visits. A solution is an indexed family Fin m → Route I, so identical routes may appear twice. Demand satisfaction uses ≥\ge≥, as constraint (2) does. The per-vehicle bound min⁡{di,Q}\min\{d_i, Q\}min{di​,Q} of constraint (14) is omitted because it changes neither the feasible route patterns nor the costs.

Explicit readings of imprecise phrases:

  • "split customer", "in common" (Theorem 1) are undefined in the paper. A customer two distinct routes visit is split, and the routes have it in common. This visit-based reading is at least as strong as a delivery-based one.
  • Corollary 2's wording "at most one arc in set Aij∗\mathcal A^*_{ij}Aij∗​ appears at most once" is read through constraint (7): the total number of traversals of the arcs of Aij∗\mathcal A^*_{ij}Aij∗​ is at most one. It is stated in the equivalent form free of the choice of A∗(N)\mathcal A^*(\mathcal N)A∗(N).
  • "there exists an optimal solution" is conditional on feasibility, which is the hypothesis added.

Ruled-out trivializations: routes are not restricted to elementary walks (that would make Remark 1 definitional), solutions are not sets (that would forbid duplicate routes), optimality compares against solutions with any number of routes and any visit pattern, "split" is never counted over visits by the same route, capacity and time windows are part of route feasibility, and deliveries occur only at visits.

Useful infrastructure, reusable beyond this mission: shortcut lemmas for feasible routes (removing a visit), exchange lemmas between two routes, and existence of an optimum for split-delivery routing. Contributions of any of these as separate lemmas are welcome.

Selected references

  • G. Desaulniers, Branch-and-Price-and-Cut for the Split-Delivery Vehicle Routing Problem with Time Windows, Operations Research 58(1):179–192, 2010. https://doi.org/10.1287/opre.1090.0713
  • M. Dror, P. Trudeau, Savings by split delivery routing, Transportation Science 23(2):141–145, 1989. https://doi.org/10.1287/trsc.23.2.141
  • M. Dror, P. Trudeau, Split delivery routing, Naval Research Logistics 37(3):383–402, 1990. https://doi.org/10.1002/nav.3800370304
  • M. Gendreau, P. Dejax, D. Feillet, C. Gueguen, Vehicle routing with time windows and split deliveries, Technical Report 2006-851, Laboratoire Informatique d'Avignon, 2006.
  • C. Archetti, M. W. P. Savelsbergh, M. G. Speranza, Worst-case analysis for split delivery vehicle routing problems, Transportation Science 40(2):226–234, 2006. https://doi.org/10.1287/trsc.1050.0117
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Functional AnalysisOperations ResearchProbability·Captain: mikedeng1

Conditional and Dynamic Convex Risk Measures I: Robust Representation of Conditional Convex Risk MeasuresResearch Paper

Motivation

A convex risk measure assigns to a bounded financial position XXX (a random net payoff) a number ρ(X)\rho(X)ρ(X), interpreted as the capital that must be added to XXX to make it acceptable. The axiomatic theory began with coherent risk measures (Artzner, Delbaen, Eber and Heath, 1999) and was extended to convex ones by Föllmer and Schied (2002) and Frittelli and Rosazza Gianin (2002). Its central structural result is a robust representation: a convex risk measure that is continuous from above equals a worst case of expected losses over a family of probabilistic models, each penalized by how implausible it is.

Regulators and risk managers do not assess positions once and for all; they reassess them as information arrives. Detlefsen and Scandolo (2005) extend the representation to conditional risk measures, whose value ρ(X)\rho(X)ρ(X) is itself a random variable measurable with respect to the information available to the agent. This is the building block of dynamic (time-consistent) risk measurement, studied in later work on dynamic risk measures and backward stochastic differential equations.

Timeline. Artzner et al. (1999): coherent risk measures on finite Ω\OmegaΩ. Delbaen (2002): coherent risk measures on general probability spaces, Fatou property. Föllmer–Schied (2002) and Frittelli–Rosazza Gianin (2002): convex risk measures and their robust representation; Föllmer–Schied, Stochastic Finance, Theorem 4.26 (2002 edition) for L∞L^\inftyL∞ with continuity from above. Detlefsen–Scandolo (2005): the conditional version, Theorem 3.2 of the paper formalized here.

Setting

Fix a probability space (Ω,F,P)(\Omega,\mathcal F,P)(Ω,F,P) and a sub-σ\sigmaσ-algebra G⊆F\mathcal G\subseteq\mathcal FG⊆F describing the available information. L∞L^\inftyL∞ is the space of essentially bounded random variables and LG∞L^\infty_{\mathcal G}LG∞​ its G\mathcal GG-measurable part; every (in)equality between random variables holds PPP-almost surely.

A map ρ:L∞→LG∞\rho:L^\infty\to L^\infty_{\mathcal G}ρ:L∞→LG∞​ is a conditional convex risk measure if ρ(0)=0\rho(0)=0ρ(0)=0 and, for X,Y∈L∞X,Y\in L^\inftyX,Y∈L∞:

  • (conditional translation invariance) ρ(X+Z)=ρ(X)−Z\rho(X+Z)=\rho(X)-Zρ(X+Z)=ρ(X)−Z for every Z∈LG∞Z\in L^\infty_{\mathcal G}Z∈LG∞​;
  • (monotonicity) X≤YX\le YX≤Y implies ρ(X)≥ρ(Y)\rho(X)\ge\rho(Y)ρ(X)≥ρ(Y);
  • (conditional convexity) ρ(ΛX+(1−Λ)Y)≤Λρ(X)+(1−Λ)ρ(Y)\rho(\Lambda X+(1-\Lambda)Y)\le\Lambda\rho(X)+(1-\Lambda)\rho(Y)ρ(ΛX+(1−Λ)Y)≤Λρ(X)+(1−Λ)ρ(Y) for every Λ∈LG∞\Lambda\in L^\infty_{\mathcal G}Λ∈LG∞​ with 0≤Λ≤10\le\Lambda\le10≤Λ≤1.

The admissible models are

PG={Q probability on (Ω,F):Q≪P, Q(A)=P(A) for all A∈G}.\mathcal P_{\mathcal G}=\{Q \text{ probability on }(\Omega,\mathcal F): Q\ll P,\ Q(A)=P(A)\text{ for all }A\in\mathcal G\}.PG​={Q probability on (Ω,F):Q≪P, Q(A)=P(A) for all A∈G}.

For a family X\mathcal XX of [−∞,+∞][-\infty,+\infty][−∞,+∞]-valued random variables, the essential supremum ess.sup⁡X\operatorname{ess.sup}\mathcal Xess.supX is the PPP-a.s. smallest random variable that dominates every member PPP-a.s.; it replaces the pointwise supremum, which is not meaningful for uncountable families of equivalence classes.

A map ρ\rhoρ is representable if there is a penalty α:PG→LG0([0,+∞])\alpha:\mathcal P_{\mathcal G}\to L^0_{\mathcal G}([0,+\infty])α:PG​→LG0​([0,+∞]) with

ρ(X)=ess.sup⁡Q∈PG{−EQ(X∣G)−α(Q)},X∈L∞.\rho(X)=\operatorname*{ess.sup}_{Q\in\mathcal P_{\mathcal G}}\{-E_Q(X\mid\mathcal G)-\alpha(Q)\},\qquad X\in L^\infty .ρ(X)=Q∈PG​ess.sup​{−EQ​(X∣G)−α(Q)},X∈L∞.

The minimal penalty is α∗(Q)=ess.sup⁡X∈L∞{−EQ(X∣G)−ρ(X)}\alpha^*(Q)=\operatorname{ess.sup}_{X\in L^\infty}\{-E_Q(X\mid\mathcal G)-\rho(X)\}α∗(Q)=ess.supX∈L∞​{−EQ​(X∣G)−ρ(X)}. ρ\rhoρ is continuous from above if Xn↘XX_n\searrow XXn​↘X PPP-a.s. implies ρ(Xn)↗ρ(X)\rho(X_n)\nearrow\rho(X)ρ(Xn​)↗ρ(X) PPP-a.s.

Formalization targets

Goal: Theorem 3.2

For a conditional convex risk measure ρ\rhoρ, the following are equivalent:

(a) ρ continuous from above  ⟺  (b) ρ representable  ⟺  (c) ρ(X)=ess.sup⁡Q∈PG{−EQ(X∣G)−α∗(Q)}.\text{(a) } \rho \text{ continuous from above}\iff\text{(b) } \rho\text{ representable}\iff\text{(c) } \rho(X)=\operatorname*{ess.sup}_{Q\in\mathcal P_{\mathcal G}}\{-E_Q(X\mid\mathcal G)-\alpha^*(Q)\}.(a) ρ continuous from above⟺(b) ρ representable⟺(c) ρ(X)=Q∈PG​ess.sup​{−EQ​(X∣G)−α∗(Q)}.

Milestones

  • Theorem A.1: existence and a.s. uniqueness of the essential supremum; an increasing sequence converging to it for upward directed families.
  • Lemma A.2: EP(ess.sup⁡X)=sup⁡X∈XEPXE_P(\operatorname{ess.sup}\mathcal X)=\sup_{X\in\mathcal X}E_PXEP​(ess.supX)=supX∈X​EP​X for upward directed X\mathcal XX.
  • The easy inequality ρ(X)≥ess.sup⁡Q{−EQ(X∣G)−α∗(Q)}\rho(X)\ge\operatorname{ess.sup}_{Q}\{-E_Q(X\mid\mathcal G)-\alpha^*(Q)\}ρ(X)≥ess.supQ​{−EQ​(X∣G)−α∗(Q)}.
  • The unconditional representation (Föllmer–Schied, Theorem 4.26) of a convex risk measure ρ0:L∞→R\rho_0:L^\infty\to\mathbb Rρ0​:L∞→R continuous from above: ρ0(X)=sup⁡Q≪P{−EQX−α0∗(Q)}\rho_0(X)=\sup_{Q\ll P}\{-E_QX-\alpha^*_0(Q)\}ρ0​(X)=supQ≪P​{−EQ​X−α0∗​(Q)}.
  • For ρ0=EP[ρ(⋅)]\rho_0=E_P[\rho(\cdot)]ρ0​=EP​[ρ(⋅)]: α0∗(Q)<∞\alpha^*_0(Q)<\inftyα0∗​(Q)<∞ forces Q∈PGQ\in\mathcal P_{\mathcal G}Q∈PG​.
  • The family BQ={−EQ(X∣G)−ρ(X):X∈L∞}B_Q=\{-E_Q(X\mid\mathcal G)-\rho(X):X\in L^\infty\}BQ​={−EQ​(X∣G)−ρ(X):X∈L∞} is upward directed.
  • EP[α∗(Q)]=α0∗(Q)E_P[\alpha^*(Q)]=\alpha^*_0(Q)EP​[α∗(Q)]=α0∗​(Q) for Q∈PGQ\in\mathcal P_{\mathcal G}Q∈PG​.
  • Representable implies continuous from above.
  • Remark 3.3: α∗≤α\alpha^*\le\alphaα∗≤α for every penalty α\alphaα, and α∗(Q)=ess.sup⁡X∈Aρ{−EQ(X∣G)}\alpha^*(Q)=\operatorname{ess.sup}_{X\in\mathcal A_\rho}\{-E_Q(X\mid\mathcal G)\}α∗(Q)=ess.supX∈Aρ​​{−EQ​(X∣G)}.

Significance

The result. Theorem 3.2 shows that a conditional convex risk measure is determined by a random penalty on the models consistent with the available information, exactly when it satisfies a sequential continuity condition. The representation is the input for the paper's later sections: the conditional entropic risk measure, whose minimal penalty is the conditional relative entropy, and the consistency of dynamic risk measures via Lemma 3.4, which is expressed through the minimal penalty. The restriction to PG\mathcal P_{\mathcal G}PG​ has an interpretation: the more information, the fewer models can enter the worst case.

Formalizing it. The theorem has been proved in the literature since 2005; to our knowledge neither it nor its unconditional counterpart has a machine-checked proof. The mission produces an essential supremum of arbitrary families of extended random variables with its existence theorem, the exchange of expectation and essential supremum for directed families, and the unconditional Föllmer–Schied representation on L∞L^\inftyL∞. The last of these is the standard representation theorem of the theory of convex risk measures and is useful well beyond this paper.

Difficulty

The obvious route, applying the unconditional representation pathwise or ω\omegaω by ω\omegaω, fails: ρ(X)(ω)\rho(X)(\omega)ρ(X)(ω) is not a risk measure of anything, and conditional expectations are only defined up to null sets that depend on QQQ, of which there are uncountably many. The essential supremum is what turns an uncountable supremum of classes into a well-defined class, and passing expectations through it requires directedness. The unconditional step itself (continuity from above implies the dual representation) rests on a Krein–Šmulian / weak* closedness argument on L∞L^\inftyL∞, which is not available off the shelf.

Formalization scope

  • Payoffs are real functions Ω→R\Omega\to\mathbb RΩ→R with MemLp X ⊤ P; ρ\rhoρ is a map (Ω→R)→(Ω→R)(\Omega\to\mathbb R)\to(\Omega\to\mathbb R)(Ω→R)→(Ω→R) constrained only on L∞L^\inftyL∞. Because it acts on functions, ρ\rhoρ is required to respect PPP-a.s. equality, and ρ(X)\rho(X)ρ(X) is required to be G\mathcal GG-strongly measurable and essentially bounded; the paper's ρ\rhoρ acts on classes, so this adds nothing in substance. G\mathcal GG is a MeasurableSpace m with m ≤ mΩ.
  • Translation invariance and convexity quantify over G\mathcal GG-measurable ZZZ and Λ\LambdaΛ (not constants). PG\mathcal P_{\mathcal G}PG​ is the subtype of probability measures Q≪PQ\ll PQ≪P with Q(A)=P(A)Q(A)=P(A)Q(A)=P(A) for all A∈GA\in\mathcal GA∈G — equality on G\mathcal GG, not mutual absolute continuity.
  • EQ(X∣G)E_Q(X\mid\mathcal G)EQ​(X∣G) is Mathlib's Q[X | m]; it is G\mathcal GG-measurable, hence determined PPP-a.s. for Q∈PGQ\in\mathcal P_{\mathcal G}Q∈PG​.
  • Extended values live in EReal; penalties are ENNReal-valued and coerced, so only (real) −(+∞)=−∞-(+\infty)=-\infty−(+∞)=−∞ occurs, never +∞−(+∞)+\infty-(+\infty)+∞−(+∞).
  • The essential supremum is a predicate IsEssSup P F Z (a.e. upper bound of every member, a.e. below every a.e.-measurable a.e. upper bound). The minimal penalty is a predicate IsMinimalPenalty on a candidate; statement (c) of the goal asserts that a G\mathcal GG-measurable [0,+∞][0,+\infty][0,+∞]-valued essential supremum of BQB_QBQ​ is a penalty for ρ\rhoρ.
  • Continuity from above: Xn,X∈L∞X_n,X\in L^\inftyXn​,X∈L∞, (Xn)(X_n)(Xn​) a.s. non-increasing and a.s. convergent to XXX implies (ρ(Xn))(\rho(X_n))(ρ(Xn​)) a.s. non-decreasing and a.s. convergent to ρ(X)\rho(X)ρ(X). It is not norm or weak* continuity.
  • Lemma A.2's "provided the expectations exist" is pinned as: each member has an expectation in [−∞,+∞][-\infty,+\infty][−∞,+∞] and some member has integrable negative part (without the latter the lemma is false). Theorem A.1's directed part assumes a nonempty family. The acceptance set of Remark 3.3 is {X∈L∞:ρ(X)≤0}\{X\in L^\infty:\rho(X)\le0\}{X∈L∞:ρ(X)≤0} (the paper's LG∞L^\infty_{\mathcal G}LG∞​ on p. 4 is a misprint).
  • Ruled out: an essential supremum defined as a pointwise ⨆ over the family, or via Mathlib's essSup of a single function, and an index set equal to all Q≪PQ\ll PQ≪P or to the QQQ equivalent to PPP; each of these changes statement (b) or makes it vacuous.
  • Needed infrastructure: essential suprema of families, extended expectations with monotone convergence, conditional expectation under a change of measure agreeing on G\mathcal GG, and the L∞L^\inftyL∞–L1L^1L1 duality behind Föllmer–Schied 4.26. The essential-supremum layer and the unconditional representation are reusable in any mission on risk measures or robust optimization; contributions to either are welcome.

Selected references

  • K. Detlefsen, G. Scandolo, Conditional and Dynamic Convex Risk Measures, SFB 649 Discussion Paper 2005-006, Humboldt-Universität zu Berlin, 2005 (the version formalized here; journal version: Finance and Stochastics 9(4), 539–561, 2005, https://doi.org/10.1007/s00780-005-0159-6)
  • H. Föllmer, A. Schied, Stochastic Finance — An Introduction in Discrete Time, de Gruyter Studies in Mathematics 27, 2002. https://doi.org/10.1515/9783110198065
  • H. Föllmer, A. Schied, Convex measures of risk and trading constraints, Finance and Stochastics 6(4), 429–447, 2002. https://doi.org/10.1007/s007800200072
  • M. Frittelli, E. Rosazza Gianin, Putting order in risk measures, Journal of Banking and Finance 26, 1473–1486, 2002. https://doi.org/10.1016/S0378-4266(02)00270-4
  • P. Artzner, F. Delbaen, J.-M. Eber, D. Heath, Coherent measures of risk, Mathematical Finance 9(3), 203–228, 1999. https://doi.org/10.1111/1467-9965.00068
  • F. Delbaen, Coherent risk measures on general probability spaces, in Advances in Finance and Stochastics, Springer, 2002. https://doi.org/10.1007/978-3-662-04790-3_1
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A Threshold of ln n for Approximating Set Cover I: The ln n Inapproximability of Set CoverResearch Paper

Motivation

Set cover is the problem of covering a finite ground set with as few members of a given family of subsets as possible. It models facility location, crew scheduling, test-suite minimization and many other selection problems in operations research, and it is one of the canonical NP-hard problems. The greedy algorithm, which repeatedly picks the subset covering the most uncovered points, finds a cover at most about ln⁡n\ln nlnn times larger than the optimum on an instance with nnn points (Johnson 1974; Lovász 1975; Chvátal 1979). Whether any efficient algorithm does substantially better was open for two decades.

Timeline of the lower bounds:

  • 1992. The PCP theorem (Arora, Lund, Motwani, Sudan, Szegedy) implies that set cover cannot be approximated within some constant 1+ε1+\varepsilon1+ε unless P = NP.
  • 1994. Lund and Yannakakis showed that set cover cannot be approximated within 14log⁡2n\tfrac14\log_2 n41​log2​n unless NP⊆TIME(nO(polylog n))\mathrm{NP}\subseteq\mathrm{TIME}(n^{O(\mathrm{polylog}\, n)})NP⊆TIME(nO(polylogn)), and within 12log⁡2n≈0.72ln⁡n\tfrac12\log_2 n\approx 0.72\ln n21​log2​n≈0.72lnn under a randomized assumption.
  • 1998. Feige showed that for every ε>0\varepsilon>0ε>0, set cover cannot be approximated within (1−ε)ln⁡n(1-\varepsilon)\ln n(1−ε)lnn unless NP⊆TIME(nO(log⁡log⁡n))\mathrm{NP}\subseteq\mathrm{TIME}(n^{O(\log\log n)})NP⊆TIME(nO(loglogn)) (J. ACM 45(4), 634–652). This matches the greedy bound up to lower-order terms.
  • 2014. Dinur and Steurer replaced the assumption by P ≠ NP (STOC 2014).

This mission formalizes Feige's theorem, the result that fixed ln⁡n\ln nlnn as the threshold.

Setting

An instance consists of nnn points {0,…,n−1}\{0,\dots,n-1\}{0,…,n−1} and a list of subsets S1,…,SsS_1,\dots,S_sS1​,…,Ss​. A cover is a set of indices whose subsets together contain every point. The instance is coverable if every point lies in some SiS_iSi​. It is written as a string: nnn in unary, then each subset as its characteristic vector.

A deterministic polynomial-time algorithm approximates set cover within ρ(n)\rho(n)ρ(n) if, for some threshold n0n_0n0​ and every coverable instance with n≥n0n \ge n_0n≥n0​ points, the value vvv it outputs satisfies OPT≤v≤ρ(n)⋅OPT\mathrm{OPT}\le v\le\rho(n)\cdot\mathrm{OPT}OPT≤v≤ρ(n)⋅OPT, where OPT\mathrm{OPT}OPT is the size of a smallest cover.

TIME(nO(log⁡log⁡n))\mathrm{TIME}(n^{O(\log\log n)})TIME(nO(loglogn)) is the class of languages that a deterministic one-tape Turing machine decides within ∣w∣c(log⁡2log⁡2∣w∣+1)+c|w|^{c(\log_2\log_2|w|+1)}+c∣w∣c(log2​log2​∣w∣+1)+c steps, for some constant ccc. Machines, P\mathrm{P}P and NP\mathrm{NP}NP are those of the published definition CookPvsNP_defs.

The proof passes through three objects, each defined in the mission:

  1. 3CNF-5 formulas: CNF formulas in which every clause has three literals on distinct variables and every variable occurs in exactly five clauses.
  2. The kkk-prover proof system of §2.3. A verifier picks ℓ\ellℓ random clauses and a distinguished variable in each. Each prover, according to its code word, receives some of these clauses and the distinguished variables of the others. Under the weak acceptance predicate, some two provers give consistent answers on the distinguished variables. Under the strong acceptance predicate, all provers do.
  3. Partition systems B(m,L,k,d)B(m,L,k,d)B(m,L,k,d) (Definition 3.1). These are LLL partitions of mmm points, each into kkk parts, such that covering the points with parts taken from pairwise different partitions needs at least ddd parts.

Formalization targets

Goal: Theorem 4.4

∃ ε>0: set cover is approximable within (1−ε)ln⁡n ⟹ NP⊆TIME(nO(log⁡log⁡n)).\exists\,\varepsilon>0:\ \text{set cover is approximable within }(1-\varepsilon)\ln n\ \Longrightarrow\ \mathrm{NP}\subseteq\mathrm{TIME}\big(n^{O(\log\log n)}\big).∃ε>0: set cover is approximable within (1−ε)lnn ⟹ NP⊆TIME(nO(loglogn)).

The statement fixes no constant beyond ε\varepsilonε. The parameters kkk, ℓ\ellℓ and mmm of the reduction are choices made inside the proof. The goal carries three cited results as hypotheses: Theorem 2.1.1 (MAX 3SAT-B gap), the consequence of Raz's parallel repetition theorem for the clause–variable game, and the Naor–Schulman–Srinivasan construction of partition systems.

Milestones, in the order the proof uses them

  1. Proposition 2.1.2: MAX 3SAT-5 is gap NP-hard.
  2. Proposition 2.2.1: the one-round clause–variable game has value 1−ε/31-\varepsilon/31−ε/3.
  3. Lemma 2.3.1: the kkk-prover system is complete with strong acceptance and has soundness k22−cℓk^2 2^{-c\ell}k22−cℓ for weak acceptance.
  4. Lemma 3.2: partition systems with d=(1−2/k)kln⁡md=(1-2/k)k\ln md=(1−2/k)klnm exist.
  5. Propositions 4.2 and 4.3: a cover with (1−δ)kQln⁡m(1-\delta)kQ\ln m(1−δ)kQlnm subsets yields a prover strategy that is weakly accepted with probability at least 2δ/(kln⁡m)22\delta/(k\ln m)^22δ/(klnm)2.
  6. Lemma 4.1: the gap between kQkQkQ and (1−2f(k))kQln⁡m(1-2f(k))kQ\ln m(1−2f(k))kQlnm.

Significance

The result. Combined with the greedy algorithm, Theorem 4.4 shows that ln⁡n\ln nlnn is the approximation threshold of set cover under a mild complexity assumption. Set cover reduces approximation-preservingly to many covering problems, so the threshold transfers to them. Examples are dominating set, several facility-location and group Steiner problems, and hitting-set formulations used in scheduling and testing. The kkk-prover system with two acceptance predicates and the partition-system gadget became standard tools for later hardness-of-approximation proofs.

Formalizing it. The theorem is proved and has been strengthened (Dinur–Steurer 2014), but no machine-checked proof of any Ω(log⁡n)\Omega(\log n)Ω(logn) inapproximability of set cover is known. This mission contributes:

  • a Lean model of multi-prover proof systems with uniform-count probabilities;
  • partition systems and their probabilistic existence proof;
  • a gap-preserving reduction whose running time is analysed on Turing machines, not merely asserted.

Difficulty

  • The ratio comes from two gaps at once. One is a gap in acceptance probability. The other is a gap between strong and weak acceptance. A reduction from a two-prover system, as in Lund–Yannakakis, loses a constant factor because a cheating cover can use two parts of the same partition. Feige's analysis must turn every small cover into a strategy under which some pair of provers is consistent (Proposition 4.3), and this averaging argument has to lose only a factor (kln⁡m)2(k\ln m)^2(klnm)2.
  • Parameters interlock. ℓ=Θ(log⁡log⁡n)\ell=\Theta(\log\log n)ℓ=Θ(loglogn) must make k22−cℓk^2 2^{-c\ell}k22−cℓ smaller than 2δ/(kln⁡m)22\delta/(k\ln m)^22δ/(klnm)2 while keeping the instance of size nO(log⁡log⁡n)n^{O(\log\log n)}nO(loglogn). The time bound must hold for a one-tape machine, including the deterministic partition-system construction.
  • Encoding. The reduction must be computed by an explicit machine on string encodings. Showing that a "clearly polynomial" construction meets the time bound on such a machine is substantial work.

Formalization scope

  • Cited results as hypotheses. Theorem 2.1.1, Raz's theorem and the Naor et al. construction are not proved in the mission; each is a named proposition (Thm211, RazRepetition, NaorPartitionSystems) and a hypothesis of the goal.
    • RazRepetition is only the consequence of Raz's theorem that the paper uses (p. 642): a 2−cℓ2^{-c\ell}2−cℓ error bound for the repeated clause–variable game on 3CNF-5 formulas far from satisfiable.
    • NaorPartitionSystems relaxes "time linear in mmm" to polynomial time and renders "LLL polynomial in ddd" as L≤⌊log⁡2m⌋aL\le\lfloor\log_2 m\rfloor^aL≤⌊log2​m⌋a. Both relaxations weaken the hypothesis.
  • Approximation in value form. The algorithm outputs a number vvv with OPT≤v≤ρ(n)OPT\mathrm{OPT}\le v\le\rho(n)\mathrm{OPT}OPT≤v≤ρ(n)OPT, and only on coverable instances with n≥n0n\ge n_0n≥n0​. Any algorithm that outputs a cover yields such a value, so this hypothesis is weaker than the paper's. The guard n≥n0n\ge n_0n≥n0​ is needed because (1−ε)ln⁡n<1(1-\varepsilon)\ln n<1(1−ε)lnn<1 for small nnn.
  • Machine model. The machines are Cook's deterministic one-tape machines. Multi-tape simulation costs a quadratic factor, which the class absorbs.
  • Probabilities are uniform counts over the (5n)ℓ(5n)^\ell(5n)ℓ random strings. Strategies are deterministic. Answers are canonical (satisfying on clause coordinates), as the paper assumes without loss of generality.
  • Not formalized. Randomized classes (ZTIME) are not defined here, so the following are omitted: the last sentence of Lemma 3.2, Proposition 6.1, and the randomized variants.
  • Ruling out a trivial formalization. The gap notion requires far-from-satisfiable formulas to have at least one clause. Otherwise the empty formula would be both a yes-instance and a no-instance, and Theorem 2.1.1 would hold trivially.
  • Infrastructure and reuse. The shared layer can serve other PCP-based hardness proofs: 3CNF-5 formulas, the kkk-prover system, partition systems, and the gap-NP-hardness notion. Welcome contributions include:
    • time bounds for list and table manipulations on one-tape machines;
    • a Hadamard-code construction satisfying the weight and distance conditions;
    • the union-bound and averaging lemmas behind Lemma 2.3.1 and Proposition 4.2.

Selected references

  • U. Feige, A threshold of ln n for approximating set cover, J. ACM 45(4), 634–652, 1998. https://doi.org/10.1145/285055.285059
  • C. Lund, M. Yannakakis, On the hardness of approximating minimization problems, J. ACM 41(5), 960–981, 1994. https://doi.org/10.1145/185675.306789
  • R. Raz, A parallel repetition theorem, SIAM J. Comput. 27(3), 763–803, 1998 (STOC 1995). https://doi.org/10.1137/S0097539795280895
  • M. Naor, L. J. Schulman, A. Srinivasan, Splitters and near-optimal derandomization, FOCS 1995, 182–191. https://doi.org/10.1109/SFCS.1995.492475
  • S. Arora, C. Lund, R. Motwani, M. Sudan, M. Szegedy, Proof verification and the hardness of approximation problems, J. ACM 45(3), 501–555, 1998. https://doi.org/10.1145/278298.278306
  • C. Papadimitriou, M. Yannakakis, Optimization, approximation, and complexity classes, J. Comput. Syst. Sci. 43(3), 425–440, 1991. https://doi.org/10.1016/0022-0000(91)90023-X
  • V. Chvátal, A greedy heuristic for the set-covering problem, Math. Oper. Res. 4(3), 233–235, 1979. https://doi.org/10.1287/moor.4.3.233
  • I. Dinur, D. Steurer, Analytical approach to parallel repetition, STOC 2014, 624–633. https://doi.org/10.1145/2591796.2591884
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Information TheoryOperations ResearchProbability·Captain: mikedeng1

Conditional and Dynamic Convex Risk Measures II: The Conditional Entropic Risk Measure and Conditional Relative EntropyResearch Paper

Motivation

A risk measure assigns to a random financial position XXX a capital requirement ρ(X)\rho(X)ρ(X): the amount of cash that must be added to XXX to make it acceptable. The axiomatic theory of convex risk measures (Föllmer–Schied 2002; Frittelli–Rosazza Gianin 2002) treats this number as computed with no information beyond the model. In practice a regulator or a risk manager revises the requirement as information arrives, so the requirement becomes a random variable measurable with respect to the information available at the time of measurement. Detlefsen and Scandolo (SFB 649 Discussion Paper 2005-006; published in Finance and Stochastics 9(4), 2005, doi:10.1007/s00780-005-0159-6) develop this conditional theory: axioms, a robust representation, and a treatment of dynamic risk measurement.

The entropic risk measure is the standard example of a convex risk measure that is not coherent. It is the capital requirement of an agent with exponential utility uγ(x)=1−e−γxu_\gamma(x)=1-e^{-\gamma x}uγ​(x)=1−e−γx, and its penalty function in the robust representation is the relative entropy 1γH(Q∣P)\frac1\gamma H(Q\mid P)γ1​H(Q∣P) (Föllmer–Schied, Stochastic Finance, Example 4.60, as cited by the paper). Section 5 of the paper carries this example to the conditional setting and shows that its penalty is a conditional relative entropy. The same identity appears in dynamic entropic risk measures, exponential-utility indifference pricing and recursive utility, where one-period conditional entropic measures are composed over time.

Setting

Fix a probability space (Ω,F,P)(\Omega,\mathcal F,P)(Ω,F,P) and a sub-σ\sigmaσ-algebra G⊆F\mathcal G\subseteq\mathcal FG⊆F, the information available at the time of measurement. L∞L^\inftyL∞ is the space of essentially bounded random variables and LG∞L^\infty_{\mathcal G}LG∞​ its G\mathcal GG-measurable part. All equalities and inequalities between random variables hold PPP-almost surely.

A conditional convex risk measure is a map ρ:L∞→LG∞\rho:L^\infty\to L^\infty_{\mathcal G}ρ:L∞→LG∞​ that is translation invariant (ρ(X+Z)=ρ(X)−Z\rho(X+Z)=\rho(X)-Zρ(X+Z)=ρ(X)−Z for Z∈LG∞Z\in L^\infty_{\mathcal G}Z∈LG∞​), monotone (X≤Y⇒ρ(X)≥ρ(Y)X\le Y\Rightarrow\rho(X)\ge\rho(Y)X≤Y⇒ρ(X)≥ρ(Y)), conditionally convex (ρ(ΛX+(1−Λ)Y)≤Λρ(X)+(1−Λ)ρ(Y)\rho(\Lambda X+(1-\Lambda)Y)\le\Lambda\rho(X)+(1-\Lambda)\rho(Y)ρ(ΛX+(1−Λ)Y)≤Λρ(X)+(1−Λ)ρ(Y) for Λ∈LG∞\Lambda\in L^\infty_{\mathcal G}Λ∈LG∞​, 0≤Λ≤10\le\Lambda\le10≤Λ≤1), and satisfies ρ(0)=0\rho(0)=0ρ(0)=0.

The relevant probability models are

PG={Q probability on (Ω,F):Q≪P, Q(A)=P(A) for all A∈G}.\mathcal P_{\mathcal G}=\{Q \text{ probability on } (\Omega,\mathcal F) : Q\ll P,\ Q(A)=P(A)\ \text{for all } A\in\mathcal G\}.PG​={Q probability on (Ω,F):Q≪P, Q(A)=P(A) for all A∈G}.

The essential supremum of a family X\mathcal XX of [−∞,+∞][-\infty,+\infty][−∞,+∞]-valued random variables is the a.s. smallest random variable that dominates every member a.s.; the essential infimum is defined symmetrically. The minimal penalty of ρ\rhoρ is

α∗(Q)=ess.sup⁡X∈L∞{−EQ(X∣G)−ρ(X)},Q∈PG.\alpha^*(Q)=\operatorname{ess.sup}_{X\in L^\infty}\{-E_Q(X\mid\mathcal G)-\rho(X)\},\qquad Q\in\mathcal P_{\mathcal G}.α∗(Q)=ess.supX∈L∞​{−EQ​(X∣G)−ρ(X)},Q∈PG​.

For a risk aversion γ>0\gamma>0γ>0, the conditional entropic risk measure is

ργ(X)=1γlog⁡EP(e−γX∣G),\rho_\gamma(X)=\frac1\gamma\log E_P\big(e^{-\gamma X}\mid\mathcal G\big),ργ​(X)=γ1​logEP​(e−γX∣G),

the capital requirement for the acceptance set Aγ={X∈L∞:EP(e−γX∣G)≤1}A_\gamma=\{X\in L^\infty : E_P(e^{-\gamma X}\mid\mathcal G)\le1\}Aγ​={X∈L∞:EP​(e−γX∣G)≤1}. For Q∈PGQ\in\mathcal P_{\mathcal G}Q∈PG​ with density φ=dQ/dP\varphi=dQ/dPφ=dQ/dP, the conditional relative entropy is

HG(Q∣P)=EP(φlog⁡φ∣G)∈[0,+∞],0log⁡0=0.H_{\mathcal G}(Q\mid P)=E_P(\varphi\log\varphi\mid\mathcal G)\in[0,+\infty],\qquad 0\log0=0.HG​(Q∣P)=EP​(φlogφ∣G)∈[0,+∞],0log0=0.

Formalization targets

Goal: Proposition 5.4

For every γ>0\gamma>0γ>0:

ργ(X)=ess.sup⁡Q∈PG{−EQ(X∣G)−1γHG(Q∣P)}(X∈L∞),α∗(Q)=1γHG(Q∣P)(Q∈PG).\rho_\gamma(X)=\operatorname{ess.sup}_{Q\in\mathcal P_{\mathcal G}}\Big\{-E_Q(X\mid\mathcal G)-\tfrac1\gamma H_{\mathcal G}(Q\mid P)\Big\}\quad(X\in L^\infty),\qquad \alpha^*(Q)=\tfrac1\gamma H_{\mathcal G}(Q\mid P)\quad(Q\in\mathcal P_{\mathcal G}).ργ​(X)=ess.supQ∈PG​​{−EQ​(X∣G)−γ1​HG​(Q∣P)}(X∈L∞),α∗(Q)=γ1​HG​(Q∣P)(Q∈PG​).

The first identity is representability with the minimal penalty as the penalty; the second identifies that penalty.

Milestones

  1. (Section 5, p. 12) ργ\rho_\gammaργ​ is a conditional convex risk measure.
  2. (Section 5, p. 12) ργ(X)=ess.inf⁡{Y∈LG∞:X+Y∈Aγ}=ess.inf⁡{Y∈LG∞:EP(e−γX∣G)≤eγY}\rho_\gamma(X)=\operatorname{ess.inf}\{Y\in L^\infty_{\mathcal G}: X+Y\in A_\gamma\}=\operatorname{ess.inf}\{Y\in L^\infty_{\mathcal G}: E_P(e^{-\gamma X}\mid\mathcal G)\le e^{\gamma Y}\}ργ​(X)=ess.inf{Y∈LG∞​:X+Y∈Aγ​}=ess.inf{Y∈LG∞​:EP​(e−γX∣G)≤eγY}.
  3. (Proof of Proposition 5.4) ργ\rho_\gammaργ​ is continuous from above: Xn↘XX_n\searrow XXn​↘X implies ργ(Xn)↗ργ(X)\rho_\gamma(X_n)\nearrow\rho_\gamma(X)ργ​(Xn​)↗ργ​(X).
  4. (Section 5, p. 13) For Q∈PGQ\in\mathcal P_{\mathcal G}Q∈PG​: EP(φ∣G)=1E_P(\varphi\mid\mathcal G)=1EP​(φ∣G)=1 and HG(Q∣P)=EQ(log⁡φ∣G)H_{\mathcal G}(Q\mid P)=E_Q(\log\varphi\mid\mathcal G)HG​(Q∣P)=EQ​(logφ∣G).
  5. (Proof of Proposition 5.4) α∗(Q)=1γess.sup⁡Z∈L∞{EQ(Z∣G)−log⁡EP(eZ∣G)}\alpha^*(Q)=\frac1\gamma\operatorname{ess.sup}_{Z\in L^\infty}\{E_Q(Z\mid\mathcal G)-\log E_P(e^Z\mid\mathcal G)\}α∗(Q)=γ1​ess.supZ∈L∞​{EQ​(Z∣G)−logEP​(eZ∣G)}.
  6. (Lemma 5.5) The conditional Donsker–Varadhan formula
ess.sup⁡Z∈L∞{EQ(Z∣G)−log⁡EP(eZ∣G)}=HG(Q∣P),Q∈PG.\operatorname{ess.sup}_{Z\in L^\infty}\{E_Q(Z\mid\mathcal G)-\log E_P(e^Z\mid\mathcal G)\}=H_{\mathcal G}(Q\mid P),\qquad Q\in\mathcal P_{\mathcal G}.ess.supZ∈L∞​{EQ​(Z∣G)−logEP​(eZ∣G)}=HG​(Q∣P),Q∈PG​.

Significance

The result gives the conditional entropic risk measure an explicit dual description: the capital requirement is a worst case over conditional models, each penalized by its conditional relative entropy. This duality is what makes entropic risk measures computable in dynamic settings. Recursive compositions of ργ\rho_\gammaργ​ over a filtration are time consistent, and their penalties add up by the chain rule for conditional relative entropy. Lemma 5.5 is also the conditional form of the Donsker–Varadhan (Gibbs) variational principle, which is used on its own in large deviations and in PAC-Bayesian bounds.

On status: the results are proved in the paper, and the unconditional versions are textbook material. Mathlib has unconditional Kullback–Leibler divergence, tilted measures, conditional Jensen's inequality and a [0,+∞][0,+\infty][0,+∞]-valued conditional expectation. As far as the platform search could establish, neither the conditional relative entropy nor the conditional Donsker–Varadhan formula nor any conditional risk measure has been formalized. This mission produces the first machine-checked conditional version, with HGH_{\mathcal G}HG​ allowed to be infinite.

Difficulty

In the unconditional case both sides of Lemma 5.5 are numbers, and the supremum is a supremum over reals. Conditionally, both sides are random variables. The supremum over the uncountable family indexed by L∞L^\inftyL∞ must be taken in the essential sense, and a pointwise supremum is neither measurable nor meaningful. The conditional relative entropy can be +∞+\infty+∞ on a set of positive probability. The integrand φlog⁡φ\varphi\log\varphiφlogφ need not be integrable, so the usual conditional expectation of L1L^1L1 is not available for it, and the "≥\ge≥" direction must reach an unbounded target through bounded test variables while controlling log⁡EP(eZ∣G)\log E_P(e^{Z}\mid\mathcal G)logEP​(eZ∣G) at the same time. The ess.sup in the goal ranges over measures, not random variables, and each EQ(⋅∣G)E_Q(\cdot\mid\mathcal G)EQ​(⋅∣G) is a conditional expectation under a different measure. These are identified with PPP-a.s. objects through the condition Q=PQ=PQ=P on G\mathcal GG.

Formalization scope

  • (Ω,F,P)(\Omega,\mathcal F,P)(Ω,F,P) is a probability space (IsProbabilityMeasure P), and G\mathcal GG is m : MeasurableSpace Ω with hm : m ≤ mΩ. Payoffs are real functions with MemLp X ⊤ P. LG∞L^\infty_{\mathcal G}LG∞​ membership is StronglyMeasurable[m] plus MemLp ⊤. Every (in)equality between random variables is PPP-a.e.
  • PG\mathcal P_{\mathcal G}PG​ is the subtype of probability measures Q≪PQ\ll PQ≪P with Q(A)=P(A)Q(A)=P(A)Q(A)=P(A) for all A∈GA\in\mathcal GA∈G. This is equality on G\mathcal GG, not equivalence of measures.
  • EP(⋅∣G)E_P(\cdot\mid\mathcal G)EP​(⋅∣G) and EQ(⋅∣G)E_Q(\cdot\mid\mathcal G)EQ​(⋅∣G) on bounded variables are Mathlib's conditional expectations P[·|m] and Q[·|m]. Bounded variables are integrable under every Q≪PQ\ll PQ≪P, so no junk value arises.
  • ργ\rho_\gammaργ​ is the paper's closed form 1γlog⁡EP(e−γX∣G)\frac1\gamma\log E_P(e^{-\gamma X}\mid\mathcal G)γ1​logEP​(e−γX∣G). The ess.inf descriptions are a milestone, and no positivity hypothesis on XXX is imposed.
  • φ\varphiφ is the real part of the Radon–Nikodym derivative Q.rnDeriv P. HG(Q∣P)H_{\mathcal G}(Q\mid P)HG​(Q∣P) and EQ(log⁡φ∣G)E_Q(\log\varphi\mid\mathcal G)EQ​(logφ∣G) are generalized conditional expectations, E(f+∣G)−E(f−∣G)E(f^+\mid\mathcal G)-E(f^-\mid\mathcal G)E(f+∣G)−E(f−∣G), built from Mathlib's [0,+∞][0,+\infty][0,+∞]-valued condLExp and valued in EReal. The negative parts are integrable, so +∞−(+∞)+\infty-(+\infty)+∞−(+∞) never arises. In EReal, a real number minus +∞+\infty+∞ is −∞-\infty−∞, which is how a model with infinite entropy drops out of the supremum.
  • Essential suprema and infima are predicates (IsEssSup, IsEssInf) on a candidate PPP-a.e. measurable EReal-valued function. The candidate must dominate every member a.s. and lie a.s. below every a.s. upper bound.
  • Continuity from above means: a.s. monotone convergence Xn↘XX_n\searrow XXn​↘X in L∞L^\inftyL∞ implies a.s. monotone convergence ρ(Xn)↗ρ(X)\rho(X_n)\nearrow\rho(X)ρ(Xn​)↗ρ(X).
  • γ\gammaγ is a real constant with γ>0\gamma>0γ>0. The random risk aversion of Remark 5.6 is not formalized.
  • Ruled out: defining HGH_{\mathcal G}HG​ through the Bochner conditional expectation P[φ * log φ | m] (which returns 000 when φlog⁡φ\varphi\log\varphiφlogφ is not integrable) or α∗\alpha^*α∗ through a pointwise supremum would make the goal false or vacuous, and so would stating it for an abstract convex risk measure in place of ργ\rho_\gammaργ​. The formalization uses the extended-valued HGH_{\mathcal G}HG​, the essential supremum, and the explicit ργ\rho_\gammaργ​.
  • The mission is self-contained. It redefines conditional convex risk measures, PG\mathcal P_{\mathcal G}PG​ and the essential supremum in its own namespace CondConvexRisk.Entropic and does not assume the general representation theorem (Theorem 3.2). The generalized conditional expectation and the conditional Donsker–Varadhan formula are reusable beyond risk measures. Contributions are welcome on the ess.sup API (existence, upward-directed families), on conditional monotone convergence for condExp, and on the conditional Jensen step for xlog⁡xx\log xxlogx.

Selected references

  • S. Detlefsen, G. Scandolo, Conditional and Dynamic Convex Risk Measures, SFB 649 Discussion Paper 2005-006, Humboldt-Universität zu Berlin, 2005 (the version formalized; published in Finance and Stochastics 9(4), 2005, https://doi.org/10.1007/s00780-005-0159-6).
  • H. Föllmer, A. Schied, Stochastic Finance: An Introduction in Discrete Time, de Gruyter, Berlin, 2002 (reference [8] of the paper).
  • H. Föllmer, A. Schied, Convex measures of risk and trading constraints, Finance and Stochastics 6:429–447, 2002. https://doi.org/10.1007/s007800200072
  • M. D. Donsker, S. R. S. Varadhan, Asymptotic evaluation of certain Markov process expectations for large time, III, Comm. Pure Appl. Math. 29:389–461, 1976. https://doi.org/10.1002/cpa.3160290405
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A Threshold of ln n for Approximating Set Cover II: The Inapproximability of Max k-CoverResearch Paper

Motivation

Max kkk-cover is the basic coverage problem of combinatorial optimization. The input is a collection of subsets of a finite ground set and a number kkk; the task is to choose kkk subsets that together cover as many points as possible. It models facility and sensor placement, the selection of a small committee or feature set representing a population, and budgeted versions of set cover. It is also the prototype of maximizing a monotone submodular function under a cardinality constraint.

The greedy algorithm covers at least a 1−1/e≈0.6321-1/e\approx 0.6321−1/e≈0.632 fraction of the optimum. This bound goes back to Hochbaum and Pathria and, for general submodular functions, to Nemhauser, Wolsey and Fisher (1978). For two decades it was not known whether a polynomial-time algorithm could do better. Uriel Feige answered the question in A Threshold of ln n for Approximating Set Cover (J. ACM 45(4), 1998, pp. 634–652, doi:10.1145/285055.285059), Section 5. His Theorem 5.3 (p. 648) states: "For any ϵ>0\epsilon > 0ϵ>0, max kkk-cover cannot be approximated in polynomial time within a ratio of (1−1/e+ϵ)(1 - 1/e + \epsilon)(1−1/e+ϵ), unless P=NPP = NPP=NP." Together with the greedy bound, it makes 1−1/e1-1/e1−1/e the exact approximation threshold of max kkk-cover.

Timeline:

  • 1978: Nemhauser, Wolsey and Fisher prove the greedy 1−1/e1-1/e1−1/e bound for monotone submodular maximization.
  • 1992: Arora, Lund, Motwani, Sudan and Szegedy prove the PCP theorem. With Papadimitriou–Yannakakis (1991) it gives Theorem 2.1.1 of the paper: MAX 3SAT-B has a constant gap unless P = NP.
  • 1994: Lund and Yannakakis introduce partition-system reductions from multi-prover proof systems to set cover.
  • 1995: Raz proves the parallel repetition theorem (Theorem 2.2.2 of the paper).
  • 1998: Feige proves the ln n threshold for set cover (the subject of mission I of this series) and the 1−1/e1-1/e1−1/e threshold for max kkk-cover.

Setting

An instance consists of nnn points {0,…,n−1}\{0,\dots,n-1\}{0,…,n−1}, a list of subsets S1,…,SsS_1,\dots,S_sS1​,…,Ss​ of the points, and a number kkk. Its value opt\mathrm{opt}opt is the largest number of points covered by at most kkk of the sets. Instances are written over a three-letter alphabet:

  • nnn in unary;
  • each set as its characteristic bit-vector;
  • kkk in unary.

Following p. 648, a polynomial-time algorithm approximates max kkk-cover within a ratio δ\deltaδ if on every input it outputs a number vvv with

δ⋅opt≤v≤opt.\delta\cdot\mathrm{opt}\le v\le\mathrm{opt}.δ⋅opt≤v≤opt.

The algorithm need not name the sets. This is the non-constructive notion of approximation.

The proof is a reduction from the MAX 3SAT-5 problem. A 3CNF-5 formula has exactly three literals per clause, over three distinct variables, and every variable occurs in exactly five clauses. The reduction goes through a kkk-prover proof system for such a formula φ\varphiφ with MMM clauses:

  • The verifier picks ℓ\ellℓ clauses at random, and a distinguished variable in each; there are R=(3M)ℓR=(3M)^\ellR=(3M)ℓ random strings rrr.
  • Each prover PiP_iPi​ is attached to a code word of length ℓ\ellℓ and weight ℓ/2\ell/2ℓ/2; distinct words are at Hamming distance at least ℓ/3\ell/3ℓ/3.
  • On coordinate jjj, prover PiP_iPi​ receives the clause if its bit is 1, and the distinguished variable if its bit is 0.
  • Answers are satisfying assignments of the received clauses and bits for the received variables.
  • Two provers are consistent if they assign the same values to the distinguished variables. The verifier weakly accepts if some pair of distinct provers is consistent, and strongly accepts if every pair is.

The max k′k'k′-cover instance of §5 attaches to every random string rrr a copy BrB_rBr​ of the explicit partition system. Its points are the vectors in {0,…,k−1}L\{0,\dots,k-1\}^L{0,…,k−1}L with L=2ℓL=2^\ellL=2ℓ, so m=kLm=k^Lm=kL. Its LLL partitions are labelled by the ℓ\ellℓ-bit strings, and each splits the points by the value of one coordinate. There are N=mRN=mRN=mR points in all. For each prover iii, question qqq and answer aaa, the set S(q,a,i)S_{(q,a,i)}S(q,a,i)​ collects, for every rrr on which PiP_iPi​ receives qqq, the iiith part of the partition of BrB_rBr​ labelled by the values that aaa gives to the distinguished variables of rrr. The budget is k′=kQk'=kQk′=kQ, where QQQ is the number of questions a single prover can receive.

Formalization targets

Goal: Theorem 5.3

∀ε>0:max k-cover is approximable within 1−1e+ε ⟹ P=NP,\forall\varepsilon>0:\quad \text{max } k\text{-cover is approximable within } 1-\tfrac1e+\varepsilon \ \Longrightarrow\ \mathrm{P}=\mathrm{NP},∀ε>0:max k-cover is approximable within 1−e1​+ε ⟹ P=NP,

conditional on the two cited results below. The ratio is left free (any ε>0\varepsilon>0ε>0), so the goal records the shape of the threshold and not a particular constant.

Milestones

  • Proposition 2.1.2 (p. 640): for some ε>0\varepsilon>0ε>0 it is NP-hard to distinguish satisfiable 3CNF-5 formulas from those in which at most a (1−ε)(1-\varepsilon)(1−ε)-fraction of the clauses can be satisfied simultaneously.
  • Lemma 2.3.1 (p. 643): a satisfiable φ\varphiφ admits a strategy that always strongly accepts; on a far-from-satisfiable φ\varphiφ the weak acceptance probability is at most k2 2−cℓk^2\,2^{-c\ell}k22−cℓ.
  • Coverage of the explicit partition system (p. 649): jjj subsets from pairwise different partitions cover exactly (1−(1−1/k)j)m(1-(1-1/k)^j)m(1−(1−1/k)j)m points.
  • Proposition 5.4 (p. 649): if at most kQkQkQ sets cover a (1−1/e+ε)(1-1/e+\varepsilon)(1−1/e+ε)-fraction of the points, then at least an ε/3\varepsilon/3ε/3-fraction of the random strings are good. Here rrr is good if wr≤3k/εw_r\le3k/\varepsilonwr​≤3k/ε sets meet BrB_rBr​ and two of them from different provers lie in the same partition.
  • Decoding (p. 649): such a covering yields a strategy that weakly accepts with probability at least (ε/3)(ε/3k)2(\varepsilon/3)(\varepsilon/3k)^2(ε/3)(ε/3k)2.
  • Gap (p. 649): a satisfiable formula gives a cover of all NNN points by kQkQkQ sets. If at most a (1−ε′)(1-\varepsilon')(1−ε′)-fraction of the clauses are satisfiable, kQkQkQ sets cover at most (1−1/e+g(k))N(1-1/e+g(k))N(1−1/e+g(k))N points, where g(k)→0g(k)\to0g(k)→0, for all large ℓ\ellℓ.
  • Proposition 5.1 (p. 647): every greedy run covers at least (1−1/e) opt(1-1/e)\,\mathrm{opt}(1−1/e)opt points.

Significance

The result closes the approximability of max kkk-cover: the greedy algorithm cannot be beaten by any constant unless P = NP. Consequences:

  • Submodular maximization. Coverage functions are monotone submodular, so the bound transfers to monotone submodular maximization under a cardinality constraint, whenever the function is given in a form that encodes a coverage instance.
  • Other problems. Hardness results for facility location, budgeted allocation, and welfare maximization with coverage valuations reduce from it.
  • The reduction itself. The ℓ\ellℓ-fold kkk-prover system combined with a partition system that is exactly countable is the template for later 1−1/e1-1/e1−1/e hardness proofs.

Status: the theorem has been proved since 1998. It has not been formalized; neither the reduction nor the underlying proof systems exist in Mathlib or on this platform. This mission produces:

  • a machine-checked reduction from MAX 3SAT-5 to max kkk-cover;
  • an exact counting lemma for product partition systems;
  • the averaging and concavity argument of Proposition 5.4;
  • a formal statement of the greedy bound for coverage.

The cited PCP-based gap (Theorem 2.1.1) and parallel repetition (Theorem 2.2.2) remain hypotheses. They are separate, much larger formalization projects.

Difficulty

The obvious argument uses the soundness of the proof system directly: a large cover should force consistent answers. It fails because a cover may spend many sets on a few random strings and cover them completely, while covering the rest partially without any two sets from the same partition. What saves the argument is exact counting. For sets from pairwise different partitions, coverage is exactly h(j)=(1−(1−1/k)j)mh(j)=(1-(1-1/k)^j)mh(j)=(1−(1−1/k)j)m, a concave function of the number jjj of sets used. Since the sets meet a random string kkk times on average, Jensen's inequality caps the total coverage of such "unstructured" strings at about (1−(1−1/k)k)(1-(1-1/k)^k)(1−(1−1/k)k), which tends to 1−1/e1-1/e1−1/e. A further obstacle is that the reduction must run in polynomial time. The paper therefore takes ℓ\ellℓ and kkk constant (unlike the set-cover reduction, where ℓ=Θ(log⁡log⁡n)\ell=\Theta(\log\log n)ℓ=Θ(loglogn)), and the soundness bound k22−cℓk^2 2^{-c\ell}k22−cℓ must beat (ε/3)(ε/3k)2(\varepsilon/3)(\varepsilon/3k)^2(ε/3)(ε/3k)2 at a constant ℓ\ellℓ. The quantifier order (kkk large first, then ℓ\ellℓ large) is part of the difficulty.

A second obstacle is the machine model. The goal is a statement about polynomial-time Turing machines, so the reduction and the decision procedure built from a hypothetical approximation algorithm must be compiled into Cook's one-tape machines.

Formalization scope

  • Machine model. CookPvsNP_defs (a published platform definition): one-tape Turing machines, P\mathrm{P}P, NP\mathrm{NP}NP, polynomial-time computable functions, CNF formulas and their encoding. "P = NP" is P Bool = NP Bool, the form in which CookPvsNP.P_ne_NP states the open problem.
  • Cited results as hypotheses. Theorem 2.1.1 enters as Thm211. Raz's theorem enters as RazRepetition, its consequence stated on p. 642: the ℓ\ellℓ-fold clause–variable game on a far-from-satisfiable 3CNF-5 formula has acceptance probability at most 2−cℓ2^{-c\ell}2−cℓ. This is weaker than Raz's general theorem, so the conditional statement is stronger. No hypothesis about max kkk-cover is assumed.
  • Approximation. The value form above, with no size threshold. For ε>1/e\varepsilon>1/eε>1/e the ratio exceeds one and the hypothesis is unsatisfiable on any instance with opt>0\mathrm{opt}>0opt>0; those values are vacuous, as in the paper.
  • opt\mathrm{opt}opt. Taken over at most kkk sets. This agrees with the paper's "exactly kkk" whenever k≤sk\le sk≤s.
  • Probability and counting. Probabilities are uniform counts over the (3M)ℓ(3M)^\ell(3M)ℓ random strings. Fractions in lower-bound statements are written as counts compared with multiples of RRR.
  • Canonical answers. The type of answers is restricted to satisfying assignments of the received clauses, following the paper's "without loss of generality" (p. 643). All indices are 0-based.
  • Partition system. The §4 construction is defined for any partition system with ℓ\ellℓ-bit partition labels and instantiated with the explicit product system. Its L=2ℓL=2^\ellL=2ℓ coordinates are the ℓ\ellℓ-bit strings themselves.
  • Not formalized. The running time of the greedy algorithm, and the constructive variant (Proposition 5.2), which belongs to the set-cover mission.

A trivializing formalization is ruled out: every cited input is a named, satisfiable proposition about 3CNF formulas or the two-prover game, never about max kkk-cover, and the approximation hypothesis is satisfiable for ratios up to 111.

Needed infrastructure, reusable beyond this mission:

  • composition and simulation lemmas for Cook's machines;
  • the uniformity of the verifier's questions on 3CNF-5 formulas;
  • concavity of j↦1−(1−1/k)jj\mapsto 1-(1-1/k)^jj↦1−(1−1/k)j;
  • (1−1/k)k→1/e(1-1/k)^k\to 1/e(1−1/k)k→1/e bounds.

Contributions to any of these, or to either cited theorem, are welcome.

Selected references

  • U. Feige, A threshold of ln n for approximating set cover, J. ACM 45(4) (1998) 634–652. https://doi.org/10.1145/285055.285059
  • R. Raz, A parallel repetition theorem, SIAM J. Comput. 27(3) (1998) 763–803 (STOC 1995). https://doi.org/10.1137/S0097539795280895
  • S. Arora, C. Lund, R. Motwani, M. Sudan, M. Szegedy, Proof verification and the hardness of approximation problems, J. ACM 45(3) (1998) 501–555. https://doi.org/10.1145/278298.278306
  • C. Papadimitriou, M. Yannakakis, Optimization, approximation, and complexity classes, J. Comput. System Sci. 43(3) (1991) 425–440. https://doi.org/10.1016/0022-0000(91)90023-X
  • C. Lund, M. Yannakakis, On the hardness of approximating minimization problems, J. ACM 41(5) (1994) 960–981. https://doi.org/10.1145/185675.306789
  • G. L. Nemhauser, L. A. Wolsey, M. L. Fisher, An analysis of approximations for maximizing submodular set functions—I, Math. Programming 14 (1978) 265–294. https://doi.org/10.1007/BF01588971
  • S. Cook, The P versus NP problem, Clay Mathematics Institute. https://www.claymath.org/wp-content/uploads/2022/06/pvsnp.pdf
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Linear-Time Approximation for Maximum Weight Matching: The Approximation Guarantee of the Scaling AlgorithmResearch Paper

Motivation

The maximum weight matching (MWM) problem asks, for a graph with edge weights, for a set of vertex-disjoint edges of largest total weight. It is a central problem of combinatorial optimization, with applications to transportation, assignment and scheduling, and as a subroutine for shortest paths, planar max cut, Chinese postman tours and metric TSP. Edmonds' blossom algorithm (1965) solves it on general graphs; the fastest implementation, due to Gabow, runs in O(mn+n2log⁡n)O(mn+n^2\log n)O(mn+n2logn) time, and the scaling algorithm of Gabow and Tarjan (1991) runs in O(mnlog⁡n log⁡(nN))O(m\sqrt{n\log n}\,\log(nN))O(mnlogn​log(nN)) time on graphs with nnn vertices, mmm edges and integer weights of magnitude at most NNN. Applications such as switch scheduling, graph clustering and sparse linear solvers accept a slightly suboptimal matching in exchange for speed. This motivates (1−ϵ)(1-\epsilon)(1−ϵ)-approximate maximum weight matchings: matchings whose weight is at least a 1−ϵ1-\epsilon1−ϵ fraction of the optimum.

Timeline of linear and near-linear time approximation for general graphs (Section 1.3 and Table IV of the paper; the entries below are as the paper attributes them):

  • Folklore: the greedy algorithm, which repeatedly takes the heaviest remaining edge, gives a 12\tfrac1221​-MWM in O(mlog⁡n)O(m\log n)O(mlogn) time.
  • Preis (STACS 1999): a 12\tfrac1221​-MWM in linear time; Drake and Hougardy (2003) gave a simpler one.
  • Drake and Hougardy (2003; journal version Vinkemeier and Hougardy, ACM Trans. Algorithms 2005): a (23−ϵ)(\tfrac23-\epsilon)(32​−ϵ)-MWM in O(mϵ−1)O(m\epsilon^{-1})O(mϵ−1) time; Pettie and Sanders (2004) improved this to O(mlog⁡ϵ−1)O(m\log\epsilon^{-1})O(mlogϵ−1).
  • Duan and Pettie (FOCS 2010) and Hanke and Hougardy (2010): a (34−ϵ)(\tfrac34-\epsilon)(43​−ϵ)-MWM in O(mlog⁡nlog⁡ϵ−1)O(m\log n\log\epsilon^{-1})O(mlognlogϵ−1) time.
  • Duan and Pettie (2014): a (1−ϵ)(1-\epsilon)(1−ϵ)-MWM in O(mϵ−1log⁡ϵ−1)O(m\epsilon^{-1}\log\epsilon^{-1})O(mϵ−1logϵ−1) time, which is linear for every fixed ϵ\epsilonϵ.

Setting

Let G=(V,E)G=(V,E)G=(V,E) be a finite simple graph with integer weights w:E→{1,…,N}w:E\to\{1,\dots,N\}w:E→{1,…,N}, N=2LN=2^LN=2L. A matching MMM is a set of vertex-disjoint edges, with weight w(M)=∑e∈Mw(e)w(M)=\sum_{e\in M}w(e)w(M)=∑e∈M​w(e); a vertex is free if no edge of MMM touches it. MMM is a ccc-MWM if c⋅w(M′)≤w(M)c\cdot w(M')\le w(M)c⋅w(M′)≤w(M) for every matching M′M'M′.

A blossom is built recursively: a single vertex {v}\{v\}{v} is a trivial blossom with E{v}=∅E_{\{v\}}=\emptysetE{v}​=∅; an odd number ≥3\ge3≥3 of disjoint blossoms A0,…,AℓA_0,\dots,A_\ellA0​,…,Aℓ​ joined in a cycle by edges ei∈Ai×Ai+1e_i\in A_i\times A_{i+1}ei​∈Ai​×Ai+1​ form the blossom B=⋃AiB=\bigcup A_iB=⋃Ai​ with edge set EB=⋃EAi∪{e0,…,eℓ}E_B=\bigcup E_{A_i}\cup\{e_0,\dots,e_\ell\}EB​=⋃EAi​​∪{e0​,…,eℓ​}. It is full if ∣M∩EB∣=(∣B∣−1)/2|M\cap E_B|=(|B|-1)/2∣M∩EB​∣=(∣B∣−1)/2. The algorithm keeps a laminar set Ω\OmegaΩ of full blossoms; a root blossom is a maximal one, and G/ΩG/\OmegaG/Ω contracts each root blossom to a single vertex.

Dual values y:V→Ry:V\to\mathbb Ry:V→R and zzz on odd vertex sets give each edge the value

yz(u,v)=y(u)+y(v)+∑B odd, u,v∈Bz(B).yz(u,v)=y(u)+y(v)+\sum_{B\ \text{odd},\ u,v\in B} z(B).yz(u,v)=y(u)+y(v)+B odd, u,v∈B∑​z(B).

The scaling algorithm (Figure 2 of the paper) has parameters NNN and ϵ′=2−g≤14\epsilon'=2^{-g}\le\tfrac14ϵ′=2−g≤41​. It runs scales i=0,…,Li=0,\dots,Li=0,…,L with granularity δi=ϵ′N/2i\delta_i=\epsilon'N/2^iδi​=ϵ′N/2i and truncated weights wi(e)=δi⌊w(e)/δi⌋w_i(e)=\delta_i\lfloor w(e)/\delta_i\rfloorwi​(e)=δi​⌊w(e)/δi​⌋. Each scale repeats four steps: augment along a maximal set of vertex-disjoint augmenting paths of the eligible graph GeligG_{\mathrm{elig}}Gelig​, shrink a maximal set of new blossoms, adjust the duals by ±δi/2\pm\delta_i/2±δi​/2, and dissolve root blossoms whose zzz-value has reached zero. It stops when the free vertices' yyy-values reach a scale-dependent value, which is 000 at scale LLL. Eligibility is given by Definition 3.2; the linear-time variant keeps the algorithm unchanged and uses Definition 3.10, which additionally ignores an edge eee in scales i>scale(e)+log⁡ϵ′−1i>\mathrm{scale}(e)+\log\epsilon'^{-1}i>scale(e)+logϵ′−1 unless it is a blossom edge.

Formalization targets

Goal: Theorem 3.12, approximation half

For every ϵ\epsilonϵ with ϵ′≤ϵ/7\epsilon'\le\epsilon/7ϵ′≤ϵ/7, the algorithm of Figure 2 with Definition 3.10 eligibility has a terminating run, and every terminating run returns a matching MMM with

w(M) ≥ (1−ϵ) w(M′)for every matching M′ of G.w(M)\ \ge\ (1-\epsilon)\,w(M')\qquad\text{for every matching } M' \text{ of } G .w(M) ≥ (1−ϵ)w(M′)for every matching M′ of G.

Milestones, in attack order

  • Lemma 2.3: approximate complementary slackness (yz(e)≥(1−ϵ0)w(e)yz(e)\ge(1-\epsilon_0)w(e)yz(e)≥(1−ϵ0​)w(e) everywhere, yz(e)≤(1+ϵ1)w(e)yz(e)\le(1+\epsilon_1)w(e)yz(e)≤(1+ϵ1​)w(e) on matched and blossom edges, zero free duals) gives a (1+ϵ1)−1(1−ϵ0)(1+\epsilon_1)^{-1}(1-\epsilon_0)(1+ϵ1​)−1(1−ϵ0​)-MWM.
  • Section 2 rescaling: rounding real weights to ⌊w/γr⌋\lfloor w/\gamma_r\rfloor⌊w/γr​⌋, γr=ϵwmax⁡/n\gamma_r=\epsilon w_{\max}/nγr​=ϵwmax​/n, loses at most a factor 1−ϵ/21-\epsilon/21−ϵ/2.
  • Lemma 3.5: with Definition 3.2 the algorithm preserves Property 3.1, which consists of granularity, active blossoms, near domination yz(e)≥wi(e)−δiyz(e)\ge w_i(e)-\delta_iyz(e)≥wi​(e)−δi​, near tightness yz(e)≤wi(e)+2(δj−δi)yz(e)\le w_i(e)+2(\delta_j-\delta_i)yz(e)≤wi​(e)+2(δj​−δi​) for type-jjj edges, and equal free duals.
  • Lemma 3.6: eligible edges searched up to scale iii weigh at least N/2i+1+δiN/2^{i+1}+\delta_iN/2i+1+δi​, and matched edges satisfy yz(e)≤(1+4ϵ′)w(e)yz(e)\le(1+4\epsilon')w(e)yz(e)≤(1+4ϵ′)w(e).
  • Lemma 3.7: the output under Definition 3.2 is a (1−5ϵ′)(1-5\epsilon')(1−5ϵ′)-MWM.
  • Theorem 3.8: the approximation half of Theorem 3.8, with ϵ′≤ϵ/5\epsilon'\le\epsilon/5ϵ′≤ϵ/5.
  • Lemma 3.11: the invariants under Definition 3.10, including yz(e)>(1−ϵ′)wi(e)yz(e)>(1-\epsilon')w_i(e)yz(e)>(1−ϵ′)wi​(e) and yz(e)<(1+6ϵ′)wi(e)yz(e)<(1+6\epsilon')w_i(e)yz(e)<(1+6ϵ′)wi​(e) once i>scale(e)+γi>\mathrm{scale}(e)+\gammai>scale(e)+γ.

Significance

The result. Theorem 3.12 gives the first algorithm for (1−ϵ)(1-\epsilon)(1−ϵ)-approximate maximum weight matching on general graphs that runs in linear time for every fixed ϵ\epsilonϵ; earlier linear-time algorithms achieved only 12\tfrac1221​ or 23−ϵ\tfrac23-\epsilon32​−ϵ. Its analysis is a relaxation of Edmonds' complementary slackness conditions that grows weaker over the scales, but not uniformly, and Lemma 2.3 certifies an approximate matching by approximately feasible duals.

Formalizing it. The result is proved in the paper. Mathlib (at the pinned revision) has matchings, alternating walks and Tutte's theorem, but no blossoms, contracted graphs or weighted matching algorithms. A complete development gives a Lean model of blossoms, contraction and augmenting paths through blossoms, a verified primal–dual invariant for a scaling algorithm, and a checked approximate-slackness certificate for matchings. Each of these can be reused to formalize Edmonds' exact algorithm or the Gabow–Tarjan scaling algorithm.

Difficulty

The two halves of the argument pull against each other. Lemma 2.3 needs near domination and near tightness as multiplicative bounds. The algorithm maintains only additive bounds whose slack for an edge of type jjj is 2(δj−δi)2(\delta_j-\delta_i)2(δj​−δi​), and this slack does not shrink as the scales advance. Converting it into a factor 1+O(ϵ′)1+O(\epsilon')1+O(ϵ′) requires a lower bound on the weight of every edge that ever became eligible, which in turn depends on the free vertices' duals following an exact schedule across scales.

For Definition 3.10 the obvious argument breaks down: an edge that is ignored after scale scale(e)+γ\mathrm{scale}(e)+\gammascale(e)+γ may violate near domination and near tightness by an amount that grows with every later dual adjustment. The claim is that the accumulated violation stays within an O(ϵ′)O(\epsilon')O(ϵ′) fraction of wi(e)w_i(e)wi​(e), and establishing this requires tracking every adjustment that can reach an ignored edge.

On the combinatorial side, the Augmentation and Blossom Shrinking steps work in the contracted graph G/ΩG/\OmegaG/Ω. Their correctness uses the classical facts that augmenting paths lift through full blossoms and that blossoms stay full after augmentation (Lemma 2.1), which have to be formalized from scratch.

Formalization scope

Graphs are SimpleGraph V on a Fintype V with decidable equality; edges are Sym2 V; matchings are Finset (Sym2 V) with pairwise vertex-disjoint edges of GGG; weights are w:Sym2 V→Nw:\mathrm{Sym2}\,V\to\mathbb Nw:Sym2V→N with 1≤w(e)≤2L1\le w(e)\le 2^L1≤w(e)≤2L on edges. Duals, δi\delta_iδi​ and wiw_iwi​ are real numbers. zzz is a function on all finite vertex sets and yzyzyz sums it over the odd sets that contain the edge, as on the page. N=2LN=2^LN=2L and ϵ′=2−g\epsilon'=2^{-g}ϵ′=2−g, g≥2g\ge2g≥2, are given through their exponents. scale(e)\mathrm{scale}(e)scale(e) uses the convention μ−1=+∞\mu_{-1}=+\inftyμ−1​=+∞. The paper's standing assumption N≤n2N\le n^2N≤n2 is used only for running time and is omitted.

The algorithm is a nondeterministic relation. A state holds MMM, Ω\OmegaΩ with its blossom edge sets, yyy, zzz, a ghost record of the scale in which each edge last entered M∪⋃B∈ΩEBM\cup\bigcup_{B\in\Omega}E_BM∪⋃B∈Ω​EB​, and the common free-vertex dual that drives the loop test. The maximal sets of augmenting paths and of new blossoms and the lifts of paths through blossoms are choices. Invariants are stated for states reachable by a run, and the goal asserts both that a terminating run exists and that every terminating run returns a (1−ϵ)(1-\epsilon)(1−ϵ)-MWM.

The running times O(mϵ−1log⁡N)O(m\epsilon^{-1}\log N)O(mϵ−1logN) of Theorem 3.8 and O(mϵ−1log⁡ϵ−1)O(m\epsilon^{-1}\log\epsilon^{-1})O(mϵ−1logϵ−1) of Theorem 3.12 are not formalized: the paper fixes no cost model, and its bounds rely on a modified depth-first search and on word-RAM table lookups. The explicit constants ϵ′≤ϵ/5\epsilon'\le\epsilon/5ϵ′≤ϵ/5 (Theorem 3.8) and ϵ′≤ϵ/7\epsilon'\le\epsilon/7ϵ′≤ϵ/7 (Theorem 3.12) are the ones the proofs supply.

The following trivializing formalizations are ruled out: a "matching" that may contain non-edges or repeated edges; a goal about a state only assumed to satisfy Property 3.1 rather than reached by the algorithm; a run relation with no terminating run, which the existence conjunct excludes; eligibility or blossoms chosen freely instead of by the page's rules; and comparison only against matchings of the contracted graph instead of all matchings of GGG.

Welcome contributions include a Lean treatment of blossoms and their contraction (Lemma 2.1, which is not a milestone here), the lift of augmenting paths, Lemmas 3.3 and 3.4 as auxiliary results, and proofs of the milestones in the order listed.

Selected references

  • R. Duan and S. Pettie, Linear-Time Approximation for Maximum Weight Matching, Journal of the ACM 61(1), Article 1, 2014. https://doi.org/10.1145/2529989
  • J. Edmonds, Maximum matching and a polyhedron with 0,1-vertices, Journal of Research of the National Bureau of Standards 69B, 125–130, 1965. https://doi.org/10.6028/jres.069B.013
  • H. N. Gabow and R. E. Tarjan, Faster scaling algorithms for general graph-matching problems, Journal of the ACM 38(4), 815–853, 1991. https://doi.org/10.1145/115234.115366
  • R. Preis, Linear time 1/2-approximation algorithm for maximum weighted matching in general graphs, STACS 1999, LNCS 1563, 259–269 (cited from the bibliography of Duan and Pettie 2014).
  • D. E. D. Vinkemeier and S. Hougardy, A linear-time approximation algorithm for weighted matchings in graphs, ACM Transactions on Algorithms 1(1), 107–122, 2005 (cited from the bibliography of Duan and Pettie 2014).
  • S. Pettie and P. Sanders, A simpler linear time 2/3 − ϵ approximation to maximum weight matching, Information Processing Letters 91(6), 271–276, 2004 (cited from the bibliography of Duan and Pettie 2014).
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Competitive Paging Algorithms I: The Marking Algorithm Is 2H_k-CompetitiveResearch Paper

Motivation

Paging is the problem of managing a two-level memory: a fast cache holds kkk pages out of an address space of nnn pages, requests to pages arrive one at a time, and a request to a page outside the cache (a page fault) forces the algorithm to bring that page in and, when the cache is full, to evict another. The cost is the number of faults. An on-line algorithm decides which page to evict without knowing future requests. The comparison of paging policies with the optimal off-line policy is where competitive analysis began.

Sleator and Tarjan showed that LRU and FIFO are within a factor kkk of the off-line optimum and that no deterministic on-line algorithm does better than kkk (Sleator–Tarjan 1985). Randomization changes the picture: Fiat, Karp, Luby, McGeoch, Sleator and Young introduced the marking algorithm and proved that its expected cost is within a factor 2Hk2H_k2Hk​ of the optimum, where Hk=1+12+⋯+1k≈ln⁡kH_k = 1 + \frac12 + \dots + \frac1k \approx \ln kHk​=1+21​+⋯+k1​≈lnk (arXiv:cs/0205038).

Timeline.

  • 1985: Sleator and Tarjan: LRU and FIFO are kkk-competitive; no deterministic algorithm beats kkk.
  • 1988: Karlin, Manasse, Rudolph and Sleator coin "competitive" and analyse flush-when-full (Algorithmica 3).
  • 1990: Manasse, McGeoch and Sleator introduce the kkk-server problem and define competitiveness for randomized algorithms (J. Algorithms 11).
  • 1991: Fiat et al.: the marking algorithm is 2Hk2H_k2Hk​-competitive, and Hn−1H_{n-1}Hn−1​-competitive when k=n−1k = n-1k=n−1; no randomized paging algorithm beats HkH_kHk​.
  • 1991: McGeoch and Sleator give an HkH_kHk​-competitive randomized paging algorithm (Algorithmica 6).
  • 2000: Achlioptas, Chrobak and Noga determine the exact competitive ratio of the marking algorithm, 2Hk−12H_k - 12Hk​−1 (Theoret. Comput. Sci. 234).

Setting

The paper works in the uniform kkk-server problem, which is isomorphic to paging. There is a set MMM of nnn vertices, enumerated e(0),…,e(n−1)e(0), \dots, e(n-1)e(0),…,e(n−1), and moving a server between two distinct vertices costs 111. There are kkk servers, 1≤k≤n1 \le k \le n1≤k≤n. A request is a vertex, and after each request some server must be on it. Cached pages are covered vertices; a fault is a server move.

The marking algorithm starts with its servers on e(0),…,e(k−1)e(0), \dots, e(k-1)e(0),…,e(k−1) and keeps a set of marked vertices, initially the covered ones. On a request to rrr:

  1. Marking. rrr is marked; the moment k+1k+1k+1 vertices are marked, all marks except the one on rrr are erased.
  2. Serving. If rrr is covered, nothing moves. Otherwise a server is chosen uniformly at random among the covered unmarked vertices and moved to rrr.

The marks are updated before the server is chosen. For a finite request sequence σ\sigmaσ, CM(σ)C_M(\sigma)CM​(σ) is the algorithm's expected number of server moves. OPT(σ)\mathrm{OPT}(\sigma)OPT(σ) is the least number of moves with which kkk servers, starting from the same configuration C0C_0C0​ and knowing σ\sigmaσ in advance, can serve σ\sigmaσ.

A randomized algorithm is ccc-competitive if there is a constant aaa such that CM(σ)≤c⋅CB(σ)+aC_M(\sigma) \le c \cdot C_B(\sigma) + aCM​(σ)≤c⋅CB​(σ)+a for every request sequence σ\sigmaσ and every algorithm BBB.

The marks divide σ\sigmaσ into phases. A new phase begins at the request that would make k+1k+1k+1 vertices marked. A vertex is clean in a phase if it was not requested in the previous phase and not yet in this one, and stale if it was requested in the previous phase but not yet in this one.

Formalization targets

Goal: Theorem 1

∃ a∈R  ∀σ:CM(σ)  ≤  2Hk⋅OPT(σ)+a.\exists\, a \in \mathbb R\ \ \forall \sigma:\qquad C_M(\sigma) \;\le\; 2H_k \cdot \mathrm{OPT}(\sigma) + a .∃a∈R  ∀σ:CM​(σ)≤2Hk​⋅OPT(σ)+a.

The constant aaa may depend on nnn, kkk and the enumeration, never on σ\sigmaσ.

Milestones (proof of Theorem 1, pp. 4–5)

  1. Without loss of generality the adversary is lazy: no move on a covered request, exactly one move otherwise (reference item, already proved on the platform).
  2. At the start of every phase the marked vertices are exactly the covered ones, and the first request of a phase is unmarked.
  3. In a phase with lll clean requests, a lazy adversary pays CA≥l−dC_A \ge l - dCA​≥l−d, where ddd counts its servers off the marking algorithm's servers at the start of the phase.
  4. It also pays CA≥d′C_A \ge d'CA​≥d′, where d′d'd′ counts its servers off the final marked set at the end of the phase.
  5. Hence CA≥max⁡(l−d,d′)≥12(l−d+d′)C_A \ge \max(l-d, d') \ge \tfrac12(l - d + d')CA​≥max(l−d,d′)≥21​(l−d+d′).
  6. A request to a stale vertex is a fault with probability c/sc/sc/s (ccc clean vertices requested so far, sss stale vertices left).
  7. The marking algorithm's expected cost in a phase is at most l(Hk−Hl+1)≤lHkl(H_k - H_l + 1) \le lH_kl(Hk​−Hl​+1)≤lHk​.

Companions

  • Theorem 2: for k=n−1k = n-1k=n−1, CM(σ)≤Hn−1⋅OPT(σ)+aC_M(\sigma) \le H_{n-1} \cdot \mathrm{OPT}(\sigma) + aCM​(σ)≤Hn−1​⋅OPT(σ)+a.
  • Tightness remark (pp. 5–6): for k=2k = 2k=2, n=4n = 4n=4 there is no aaa with CM(σ)≤H2⋅OPT(σ)+aC_M(\sigma) \le H_2 \cdot \mathrm{OPT}(\sigma) + aCM​(σ)≤H2​⋅OPT(σ)+a for all σ\sigmaσ.

Significance

The result. Theorem 1 was the first proof that randomization beats the deterministic barrier kkk for paging, bringing the ratio down to O(log⁡k)O(\log k)O(logk). Together with the paper's lower bound HkH_kHk​ for every randomized algorithm, it determines the randomized competitive ratio of paging up to a factor 222. Its phase and clean/stale accounting is reused throughout the analysis of randomized caching.

Formalizing it. The theorem is proved (1991). As far as is known it has no machine-checked proof. Formalizing it requires a probabilistic model of a randomized on-line algorithm, an off-line optimum, and a phase decomposition with an exchangeability argument, and these are the first such objects in this library. Theorem 2 and the k=2k = 2k=2, n=4n = 4n=4 example use the same definitions and also check that the formal algorithm is the paper's. The sharp ratio 2Hk−12H_k - 12Hk​−1 is a natural follow-up.

Difficulty

The comparison is between a random process and a deterministic adversary, and each side has its own obstacle.

On the algorithm's side, the configuration inside a phase is random, and the fault probability of a stale request depends on the whole history of the phase. The claim that the ccc uncovered stale vertices form a uniformly random subset of the sss stale ones is an exchangeability property of the process, and must be established from the step-by-step uniform choice. The worst-case ordering of the requests within a phase then has to be justified as a bound, not assumed.

On the adversary's side, the per-phase bound max⁡(l−d,d′)\max(l-d, d')max(l−d,d′) does not sum directly. The ddd and d′d'd′ terms telescope across phases only because the configuration of the marking algorithm at each phase boundary is deterministic. The first phase, which begins after an initial run of requests to e(0),…,e(k−1)e(0), \dots, e(k-1)e(0),…,e(k−1), and the last, incomplete phase have to be absorbed into the additive constant.

Formalization scope

The vertex set is an abstract metric space MMM with e:Fin n≃Me : \mathrm{Fin}\,n \simeq Me:Finn≃M and dist(x,y)=1\mathrm{dist}(x,y) = 1dist(x,y)=1 for x≠yx \ne yx=y. The natural metric ∣i−j∣|i - j|∣i−j∣ on Fin n\mathrm{Fin}\,nFinn is deliberately not used. The configurations and the off-line optimum OPT\mathrm{OPT}OPT are the published KServer definitions (KServer.Config, KServer.offlineCost), with OPT\mathrm{OPT}OPT taken from the marking algorithm's initial configuration. An off-line algorithm starting elsewhere changes the cost by at most kkk, which is absorbed into aaa.

The marking algorithm is a Markov chain on pairs (covered set, marked set). Each step is a PMF, with the eviction drawn by PMF.uniformOfFinset from the covered unmarked vertices. The expected cost is the sum over requests of the probability that the request is not covered, which is exact because the algorithm moves exactly one server per fault. Harmonic numbers are Mathlib's harmonic, cast to R\mathbb RR. Phases, clean counts and lazy off-line schedules are defined once, in the mission's definition file, and all milestones use them.

A trivializing formalization is ruled out as follows. The additive constant is quantified before σ\sigmaσ, so a per-sequence constant cannot be used. The comparison is with the optimum over all off-line schedules, not a particular one. The random choice is among the covered unmarked vertices, with marks updated first. The hypothesis 1≤k≤n1 \le k \le n1≤k≤n excludes the degenerate case k=0k = 0k=0, where H0=0H_0 = 0H0​=0.

Proofs of individual milestones are welcome. The laziness reduction for off-line schedules, the exchangeability lemma for the uniform eviction process, and the harmonic-sum identity ∑j=l+1kl/j=l(Hk−Hl)\sum_{j=l+1}^{k} l/j = l(H_k - H_l)∑j=l+1k​l/j=l(Hk​−Hl​) are reusable beyond this mission.

Selected references

  • A. Fiat, R. M. Karp, M. Luby, L. A. McGeoch, D. D. Sleator, N. E. Young, Competitive Paging Algorithms, J. Algorithms 12(4):685–699, 1991; arXiv:cs/0205038v1. https://arxiv.org/abs/cs/0205038
  • D. D. Sleator, R. E. Tarjan, Amortized Efficiency of List Update and Paging Rules, Comm. ACM 28(2):202–208, 1985. https://doi.org/10.1145/2786.2793
  • A. R. Karlin, M. S. Manasse, L. Rudolph, D. D. Sleator, Competitive Snoopy Caching, Algorithmica 3:79–119, 1988. https://doi.org/10.1007/BF01762111
  • M. S. Manasse, L. A. McGeoch, D. D. Sleator, Competitive Algorithms for Server Problems, J. Algorithms 11(2):208–230, 1990. https://doi.org/10.1016/0196-6774(90)90003-W
  • L. A. McGeoch, D. D. Sleator, A Strongly Competitive Randomized Paging Algorithm, Algorithmica 6:816–825, 1991. https://doi.org/10.1007/BF01759073
  • D. Achlioptas, M. Chrobak, J. Noga, Competitive Analysis of Randomized Paging Algorithms, Theoret. Comput. Sci. 234:203–218, 2000. https://doi.org/10.1016/S0304-3975(98)00116-9
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Competitive Paging Algorithms II: Algorithm EATR Is 3/2-Competitive for Two ServersResearch Paper

Motivation

Paging is the problem of managing a two-level memory: a fast cache holding kkk pages and a slow memory holding the rest. When a requested page is not in the cache (a page fault), it must be brought in and, if the cache is full, some page must be evicted. An on-line paging algorithm decides which page to evict without knowing future requests. Sleator and Tarjan (CACM 1985) compared on-line algorithms with the optimal off-line algorithm on every request sequence and showed that the best deterministic algorithms (LRU, FIFO) lose a factor of exactly kkk, and that no deterministic on-line algorithm does better.

Randomization changes this picture. Fiat, Karp, Luby, McGeoch, Sleator and Young (J. Algorithms 1991; arXiv:cs/0205038) showed that the randomized marking algorithm is 2Hk2H_k2Hk​-competitive, where Hk=1+12+⋯+1kH_k=1+\tfrac12+\dots+\tfrac1kHk​=1+21​+⋯+k1​, and that no randomized algorithm is better than HkH_kHk​-competitive. For k<n−1k<n-1k<n−1 the marking algorithm does not reach HkH_kHk​, already for k=2k=2k=2 and n=4n=4n=4. For two servers the same paper gives a different algorithm, EATR ("end after twice requested"), and proves it 3/23/23/2-competitive. Since H2=3/2H_2=3/2H2​=3/2, EATR is strongly competitive for k=2k=2k=2: no randomized algorithm has a smaller competitive factor. This mission formalizes that result.

Timeline:

  • 1985: Sleator and Tarjan, deterministic paging: factor kkk, and kkk is optimal.
  • 1988: Karlin, Manasse, Rudolph and Sleator introduce the term competitive (Algorithmica 3:79–119); Manasse, McGeoch and Sleator formulate the kkk-server problem and extend competitiveness to randomized algorithms (J. Algorithms 1990).
  • 1991: Fiat et al.: the marking algorithm is 2Hk2H_k2Hk​-competitive, the lower bound HkH_kHk​, and EATR is 3/23/23/2-competitive for k=2k=2k=2.
  • 1991: McGeoch and Sleator give an HkH_kHk​-competitive algorithm for every kkk (Algorithmica 6, 1991; reference [12] of the paper).

Setting

The uniform 222-server problem has a finite set MMM of n≥2n\ge 2n≥2 vertices, any two distinct vertices at distance 111, and two servers. A request sequence σ=σ(0),σ(1),…\sigma=\sigma(0),\sigma(1),\dotsσ=σ(0),σ(1),… is a list of vertices; each request must be covered by a server when it is served, and the cost is the number of server moves. This is paging with a cache of two pages: vertices are pages and the covered vertices are the cache.

A deterministic algorithm BBB has a cost CB(σ)C_B(\sigma)CB​(σ); a randomized algorithm AAA has an expected cost CA(σ)C_A(\sigma)CA​(σ), averaged over its random choices. AAA is ccc-competitive if there is a constant aaa such that for every request sequence σ\sigmaσ and every deterministic algorithm BBB (on-line or off-line),

CA(σ)≤c⋅CB(σ)+a.C_A(\sigma)\le c\cdot C_B(\sigma)+a.CA​(σ)≤c⋅CB​(σ)+a.

Algorithm EATR. The servers start on the vertices 111 and 222. The algorithm divides σ\sigmaσ into phases; the first phase starts at the first request to a vertex other than 111 and 222. Let PPP be the set of vertices occupied by the servers at the end of the previous phase ({1,2}\{1,2\}{1,2} before the first phase). During a phase, a vertex is clean if it is not in PPP and has not been requested during this phase; a vertex is stale if it is neither clean nor the most recently requested vertex ℓ\ellℓ. EATR keeps one server on ℓ\ellℓ and the other uniformly at random on the stale set. When a stale vertex rrr is requested, the servers are placed on ℓ\ellℓ and rrr and the phase ends; the next phase starts at the next request to a vertex not covered by a server. Requests between phases, and repeated requests to ℓ\ellℓ, move nothing.

For a phase, lll denotes the number of clean vertices requested in it. For a deterministic algorithm AAA, ddd and d′d'd′ denote the numbers of AAA's servers that do not coincide with any of EATR's servers at the beginning and at the end of the phase. An algorithm is lazy if it moves no server on a request to a covered vertex and exactly one server on a request to an uncovered one.

Formalization targets

Goal: Theorem 3

With OPT(σ)\mathrm{OPT}(\sigma)OPT(σ) the optimal off-line cost of serving σ\sigmaσ from the servers' starting position (1,2)(1,2)(1,2), there is a constant ccc such that for all σ\sigmaσ

CEATR(σ)≤32 OPT(σ)+c.C_{\mathrm{EATR}}(\sigma)\le \tfrac32\,\mathrm{OPT}(\sigma)+c.CEATR​(σ)≤23​OPT(σ)+c.

The constant ccc is left free; the factor 3/23/23/2 is the paper's and is optimal.

Milestones, in the order of the proof

  1. Laziness (p. 4): every deterministic algorithm is dominated by a lazy one (a published theorem, reused).
  2. Adversary bound for structured phases (p. 5): in a complete EATR phase with lll clean requests, a lazy AAA pays at least l−d+d′l-d+d'l−d+d′.
  3. Stale set before the terminating request (p. 6): it has l+1l+1l+1 elements, each covered with probability 1/(l+1)1/(l+1)1/(l+1).
  4. Expected cost of a phase to EATR (p. 6): exactly l+ll+1l+\frac{l}{l+1}l+l+1l​.
  5. Per-phase ratio (p. 6): EATR's expected phase cost is at most 32(CA+d−d′)\tfrac32(C_A+d-d')23​(CA​+d−d′), since l+l/(l+1)l=1+1l+1≤32\frac{l+l/(l+1)}{l}=1+\frac{1}{l+1}\le\frac32ll+l/(l+1)​=1+l+11​≤23​.

Significance

The result. Theorem 3 settles the randomized competitive ratio of paging with two cache slots: combined with the paper's lower bound HkH_kHk​ (Corollary 5, the subject of a companion mission), the optimal factor for k=2k=2k=2 is exactly 3/23/23/2, against 222 for every deterministic algorithm. The general case was settled later by McGeoch and Sleator's HkH_kHk​-competitive partitioning algorithm, which is considerably more complicated.

Formalizing it. The result has been proved since 1991; no machine-checked proof of it is on the platform (a search for EATR, randomized paging and two-server results on 2026-09-26 found only deterministic kkk-server theorems). The mission produces a formal model of a randomized on-line algorithm as a probability distribution over states evolving with the request sequence, a formal treatment of the phase decomposition and of the telescoping amortization that relates expected on-line cost to the optimal off-line cost, and a first strongly competitive randomized paging result on the platform, alongside the deterministic kkk-server results already there.

Difficulty

The per-phase computations are short. The main difficulty is the global accounting. The adversary's cost in a phase is bounded only in amortized form, l−d+d′l-d+d'l−d+d′, where ddd and d′d'd′ compare the adversary's servers with EATR's at the phase boundaries; the bound becomes a statement about OPT\mathrm{OPT}OPT only after the ddd and d′d'd′ terms telescope across phases. This needs care with the requests that lie outside every phase (before the first phase, between phases, and in an unfinished last phase), during which the adversary may move. A further difficulty is that the off-line optimum ranges over arbitrary schedules, which may move several servers on one request, while the phase bound is proved for lazy on-line algorithms: the reduction from one to the other must be made explicit. Finally, the uniform law of the stale server is an invariant of a Markov chain on states that must be tracked through the whole phase.

Formalization scope

The vertices are an abstract metric space MMM with an enumeration e:Fin n≃Me:\mathrm{Fin}\,n\simeq Me:Finn≃M, 2≤n2\le n2≤n, and the hypothesis that distinct points are at distance 111; the metric of Fin n\mathrm{Fin}\,nFinn is not used. The starting vertices 1,21,21,2 are e(0),e(1)e(0),e(1)e(0),e(1). OPT\mathrm{OPT}OPT is KServer.offlineCost of the published KServer model: the infimum of total movement over all schedules serving σ\sigmaσ from (e(0),e(1))(e(0),e(1))(e(0),e(1)). Comparing with this infimum covers every deterministic BBB starting from EATR's position; a BBB starting elsewhere differs by at most 222, which the constant absorbs. The constant is quantified before σ\sigmaσ.

EATR is a PMF over states: a deterministic record (the set PPP, whether a phase is in progress, the last requested vertex, the vertices requested in the phase) and the random position of the second server. Its expected cost is the expected number of server moves, summed over the requests. The paper fixes only that the second server is uniform on the stale set; when a clean request enlarges the stale set, the formalization moves one server by a fixed coupling that keeps the law uniform, and this choice is stated in the definition. A formalization that defines EATR's expected cost by the closed formula of the proof, or that restricts σ\sigmaσ to complete phases, would make the goal a different statement; neither is done here. The pre-phase prefix and an unfinished last phase belong to σ\sigmaσ and are covered by the constant.

Needed infrastructure: finite probability distributions (Mathlib's PMF), the published KServer model and its laziness theorem, and bookkeeping lemmas on the deterministic phase record. The phase record and the amortization argument are reusable for the marking algorithm of the companion mission. Proofs of any milestone, and alternative decompositions of the goal, are welcome.

Selected references

  • A. Fiat, R. M. Karp, M. Luby, L. A. McGeoch, D. D. Sleator, N. E. Young, Competitive Paging Algorithms, Journal of Algorithms 12(4):685–699, 1991. https://doi.org/10.1016/0196-6774(91)90041-V ; arXiv:cs/0205038v1, https://arxiv.org/abs/cs/0205038
  • D. D. Sleator, R. E. Tarjan, Amortized Efficiency of List Update and Paging Rules, Communications of the ACM 28(2):202–208, 1985. https://doi.org/10.1145/2786.2793
  • M. S. Manasse, L. A. McGeoch, D. D. Sleator, Competitive Algorithms for Server Problems, Journal of Algorithms 11(2):208–230, 1990. https://doi.org/10.1016/0196-6774(90)90003-W
  • L. A. McGeoch, D. D. Sleator, A Strongly Competitive Randomized Paging Algorithm, Algorithmica 6:816–825, 1991 (reference [12] of the paper).
  • A. R. Karlin, M. S. Manasse, L. Rudolph, D. D. Sleator, Competitive Snoopy Caching, Algorithmica 3(1):79–119, 1988 (reference [9] of the paper).
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Competitive Paging Algorithms III: No Randomized Paging Algorithm Is Better than H_k-CompetitiveResearch Paper

Motivation

Paging is the problem of managing a two-level memory: a cache holds kkk of the nnn pages a program uses, every request must find its page in the cache, and a request to a page outside the cache (a page fault) forces the algorithm to bring the page in and evict another. An on-line algorithm chooses what to evict without seeing future requests. Sleator and Tarjan (CACM 1985) measured on-line paging algorithms against the optimal off-line algorithm, which knows the whole request sequence, and showed that no deterministic on-line algorithm can be within a factor smaller than kkk of it.

Randomization changes that picture. Fiat, Karp, Luby, McGeoch, Sleator and Young (J. Algorithms 1991; arXiv:cs/0205038) gave a randomized algorithm, the marking algorithm, whose expected number of faults is within 2Hk2H_k2Hk​ of the optimum, where Hk=1+12+⋯+1k≈ln⁡kH_k = 1 + \tfrac12 + \dots + \tfrac1k \approx \ln kHk​=1+21​+⋯+k1​≈lnk. This mission formalizes the other half of their paper's picture: no randomized paging algorithm can do better than HkH_kHk​. The bound says that the logarithmic behaviour is not an artefact of one algorithm but a property of the problem.

Timeline:

  • 1985 — Sleator and Tarjan: deterministic paging algorithms have competitive factor at least kkk; LRU and FIFO achieve kkk.
  • 1988 — Karlin, Manasse, Rudolph and Sleator (Algorithmica 3, 1988) introduce the term competitive; Manasse, McGeoch and Sleator (STOC 1988; J. Algorithms 1990) extend it to randomized algorithms and pose the kkk-server problem, of which paging is the uniform-metric case.
  • 1991 — Fiat et al.: the marking algorithm is 2Hk2H_k2Hk​-competitive, and no randomized algorithm is better than HkH_kHk​-competitive (Theorem 4 and Corollary 5 of the paper). Raghavan gave an alternative proof of the lower bound through Yao's minimax principle.
  • 1991 — McGeoch and Sleator give an HkH_kHk​-competitive randomized paging algorithm (Algorithmica 6, 1991), so the lower bound is tight.

Setting

Let MMM be a set of nnn vertices with the uniform metric: any two distinct vertices are at distance 111. A configuration of kkk servers is a map C:{1,…,k}→MC : \{1,\dots,k\} \to MC:{1,…,k}→M; server sss sits at C(s)C(s)C(s), and a vertex is covered when some server sits on it. A request sequence σ\sigmaσ is a finite list of vertices. A deterministic on-line algorithm assigns to every prefix of requests the configuration after serving it, in such a way that the vertex just requested is covered; its cost on σ\sigmaσ is the total distance travelled by its servers, which on the uniform metric is the number of server moves. Paging with kkk cache slots and nnn pages is exactly this kkk-server problem on nnn uniform vertices.

The optimal off-line cost OPTC0(σ)\mathrm{OPT}_{C_0}(\sigma)OPTC0​​(σ) is the least cost of any schedule of configurations that starts at C0C_0C0​ and covers each request of σ\sigmaσ in turn.

A randomized on-line algorithm AAA is a probability space (Ω,μ)(\Omega,\mu)(Ω,μ) of coin outcomes together with a deterministic on-line algorithm AωA_\omegaAω​ for each outcome ω\omegaω. Its expected cost CA(σ)C_A(\sigma)CA​(σ) is the average of the cost of AωA_\omegaAω​ on σ\sigmaσ over ω\omegaω. The request sequence is fixed in advance and does not depend on the coins (an oblivious adversary). Following the paper, AAA is ccc-competitive from the initial configuration C0C_0C0​ if there is a constant aaa such that

CA(σ)  ≤  c⋅OPTC0(σ)+afor every request sequence σ.C_A(\sigma) \;\le\; c \cdot \mathrm{OPT}_{C_0}(\sigma) + a \qquad \text{for every request sequence } \sigma .CA​(σ)≤c⋅OPTC0​​(σ)+afor every request sequence σ.

For the lower-bound argument, the probability vector p=(pi)i∈Mp=(p_i)_{i\in M}p=(pi​)i∈M​ after a prefix σ\sigmaσ has pip_ipi​ equal to the probability, over ω\omegaω, that vertex iii is not covered by AωA_\omegaAω​ after serving σ\sigmaσ. A set SSS of marked vertices and the number u=n−∣S∣u = n - |S|u=n−∣S∣ of unmarked vertices are bookkeeping of the adversary, updated as the marking algorithm would update them.

Formalization targets

Goal: Corollary 5

For 1≤k≤n−11 \le k \le n-11≤k≤n−1, every randomized on-line algorithm AAA with kkk servers on nnn uniform vertices, every initial configuration C0C_0C0​ and every real ccc,

c<Hk  ⟹  A is not c-competitive from C0.c < H_k \;\Longrightarrow\; A \text{ is not } c\text{-competitive from } C_0 .c<Hk​⟹A is not c-competitive from C0​.

Theorem 4 (milestone)

The case k=n−1k = n-1k=n−1: no randomized algorithm for the uniform (n−1)(n-1)(n−1)-server problem on nnn vertices is ccc-competitive with c<Hn−1c < H_{n-1}c<Hn−1​.

Claims of the proof of Theorem 4 (milestones)

With ppp the probability vector, SSS the marked set, P=∑i∈SpiP = \sum_{i\in S} p_iP=∑i∈S​pi​ and u=n−∣S∣u = n - |S|u=n−∣S∣:

∑ipi=1(servers on distinct vertices),CA(σ i)≥CA(σ)+pi,\sum_i p_i = 1 \quad(\text{servers on distinct vertices}),\qquad C_A(\sigma\,i) \ge C_A(\sigma) + p_i,i∑​pi​=1(servers on distinct vertices),CA​(σi)≥CA​(σ)+pi​, P=0⇒∃ i∉S, pi≥1u,P>ϵ>0⇒max⁡j∈Spj≥ϵ∣S∣>0,P = 0 \Rightarrow \exists\, i\notin S,\ p_i \ge \tfrac1u, \qquad P > \epsilon > 0 \Rightarrow \max_{j\in S} p_j \ge \tfrac{\epsilon}{|S|} > 0,P=0⇒∃i∈/S, pi​≥u1​,P>ϵ>0⇒j∈Smax​pj​≥∣S∣ϵ​>0, pj=max⁡j′∉Spj′⇒pj≥1−Pu,P≤ϵ⇒ϵ+pj≥ϵ+1−Pu≥ϵ+1−ϵu≥1u.p_j = \max_{j'\notin S} p_{j'} \Rightarrow p_j \ge \tfrac{1-P}{u}, \qquad P \le \epsilon \Rightarrow \epsilon + p_j \ge \epsilon + \tfrac{1-P}{u} \ge \epsilon + \tfrac{1-\epsilon}{u} \ge \tfrac1u .pj​=j′∈/Smax​pj′​⇒pj​≥u1−P​,P≤ϵ⇒ϵ+pj​≥ϵ+u1−P​≥ϵ+u1−ϵ​≥u1​.

Significance

The result. Together with the marking algorithm's 2Hk2H_k2Hk​ upper bound, the corollary pins the randomized competitive ratio of paging to Θ(log⁡k)\Theta(\log k)Θ(logk), an exponential improvement over the deterministic ratio kkk that no randomized algorithm can push below HkH_kHk​. For k=n−1k = n-1k=n−1 the marking algorithm itself is Hn−1H_{n-1}Hn−1​-competitive, so Theorem 4 makes it optimal there. The HkH_kHk​ bound is the benchmark every later randomized paging algorithm is measured against, including the HkH_kHk​-competitive algorithm of McGeoch and Sleator, and it is the uniform-metric base case of the randomized kkk-server conjecture.

Formalizing it. The theorem is proved and classical; no machine-checked proof is known to exist. The platform already has the deterministic bound (KServer.uniform_not_competitive_below_k, ratio kkk) and a formal Yao averaging principle for randomized kkk-server algorithms (KServer.randomized_yao_averaging), but no randomized paging lower bound. This mission produces the first formal HkH_kHk​ lower bound, stated against the published randomized kkk-server model, and a formal version of the paper's adversary argument. Either route — the paper's adaptive construction of a nemesis sequence from the probability vector, or Raghavan's distributional argument through Yao's principle — is welcome.

Difficulty

The adversary may not look at the coins, yet it must build one fixed sequence against which the expected cost is high in every phase. Requesting an uncovered vertex is not available, since which vertex is uncovered depends on the coins; requesting the vertex with the largest uncovered probability gives only 1/n1/n1/n per request and loses the harmonic sum. Lifting the per-phase bound to the asymptotic statement also requires handling the additive constant aaa, the initial configuration of the off-line algorithm, and, for Corollary 5, the reduction from nnn vertices to k+1k+1k+1 of them for an algorithm that may still place servers on the others.

Formalization scope

The Lean development reuses the published definitions KServer_model (configurations Fin k → M, deterministic on-line algorithms as functions of the request prefix, offlineCost) and KServer_randomized (RandomizedAlgorithm: a probability measure on coin outcomes, a deterministic algorithm per outcome, measurable costs; expCost as a lower Lebesgue integral in [0,∞][0,\infty][0,∞]; IsCompetitiveFrom C₀ c: every drawn algorithm starts at C0C_0C0​ and there is one constant aaa, fixed before the sequence, with expCost σ ≤ ENNReal.ofReal (c * offlineCost C₀ σ + a)). The clamp at 000 in ENNReal.ofReal only weakens the property the goal refutes. The vertex set is an abstract type MMM with an equivalence Fin n ≃ M and the uniform metric as a hypothesis, never the line metric of Fin n. HkH_kHk​ is Mathlib's harmonic k cast to R\mathbb RR. The goal quantifies over every algorithm and every initial configuration, with no laziness or distinct-positions assumption, and over every real c<Hkc < H_kc<Hk​, including c≤0c \le 0c≤0.

A formalization in which competitiveness is vacuous (a model with no algorithms, or a cost that is always infinite), in which the adversary may choose the sequence after seeing the coins, or which fixes ccc or the additive constant, would be a different statement and is ruled out by the published definitions used here.

The probability vector is the one new definition, uncoveredProb A σ i. Milestones about it assume the uncovered events measurable, the standing convention that pip_ipi​ is a probability; the model itself only guarantees measurable costs. The milestone ∑ipi=1\sum_i p_i = 1∑i​pi​=1 assumes the n−1n-1n−1 servers occupy distinct vertices, as in the paper; in general ∑ipi≥1\sum_i p_i \ge 1∑i​pi​≥1. The arithmetic milestones are stated for an arbitrary probability vector on a finite set. Reusable pieces: the probability vector and the cost lemma apply to any randomized kkk-server algorithm on a uniform metric, and a restriction lemma (from nnn vertices to k+1k+1k+1) would serve other paging lower bounds.

Selected references

  • A. Fiat, R. M. Karp, M. Luby, L. A. McGeoch, D. D. Sleator, N. E. Young, Competitive Paging Algorithms, J. Algorithms 12(4):685–699, 1991. https://doi.org/10.1016/0196-6774(91)90041-V ; preprint arXiv:cs/0205038v1 (cited version). https://arxiv.org/abs/cs/0205038
  • D. D. Sleator, R. E. Tarjan, Amortized Efficiency of List Update and Paging Rules, Comm. ACM 28(2):202–208, 1985. https://doi.org/10.1145/2786.2793
  • M. S. Manasse, L. A. McGeoch, D. D. Sleator, Competitive Algorithms for Server Problems, J. Algorithms 11(2):208–230, 1990. https://doi.org/10.1016/0196-6774(90)90003-W
  • L. A. McGeoch, D. D. Sleator, A Strongly Competitive Randomized Paging Algorithm, Algorithmica 6:816–825, 1991.
  • P. Raghavan, Lecture Notes on Randomized Algorithms, IBM Research Report, Yorktown Heights, 1990 (the alternative proof of the lower bound, pp. 118–119).
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The Erdős Matching Conjecture and Concentration Inequalities: The Conjecture in a Linear RangeResearch Paper

Motivation

In 1965 Erdős asked how large a family of kkk-element subsets of an nnn-element set can be if it contains no s+1s+1s+1 pairwise disjoint members. The question, now called the Erdős Matching Conjecture (EMC), contains the Erdős–Ko–Rado theorem (the case s=1s=1s=1) and is one of the central open problems of extremal set theory. Beyond combinatorics it is tied to tail bounds for sums of random variables (generalizations of Markov's inequality, see Alon, Frankl, Huang, Rödl, Ruciński and Sudakov, JCTA 2012, as cited on p. 2 of the paper) and to Dirac-type thresholds for perfect matchings in hypergraphs.

Timeline.

  • 1965: Erdős proves the conjecture for n≥n0(k,s)n\ge n_0(k,s)n≥n0​(k,s).
  • 1959/1968: Erdős–Gallai settle k=2k=2k=2; Kleitman settles the case n=k(s+1)n=k(s+1)n=k(s+1) implicitly.
  • 1976: Bollobás, Daykin and Erdős prove it for n≥2k3sn\ge2k^3sn≥2k3s.
  • 2012: Huang, Loh and Sudakov prove it for n≥3k2sn\ge3k^2sn≥3k2s.
  • 2013: Frankl proves it for n≥(2s+1)k−sn\ge(2s+1)k-sn≥(2s+1)k−s (JCTA 120).
  • 2017: Frankl settles k=3k=3k=3 completely.
  • 2018–2022: Frankl and Kupavskii prove it for n≥53sk−23sn\ge\frac53sk-\frac23sn≥35​sk−32​s and all s≥s0s\ge s_0s≥s0​ (arXiv:1806.08855), the result of this mission.

Setting

Write [n]={1,…,n}[n]=\{1,\dots,n\}[n]={1,…,n} and ([n]k)\binom{[n]}{k}(k[n]​) for the set of its kkk-element subsets. For a family F⊆([n]k)\mathcal F\subseteq\binom{[n]}kF⊆(k[n]​), a matching is a subfamily of pairwise disjoint members, and the matching number ν(F)\nu(\mathcal F)ν(F) is the largest size of a matching. The Erdős matching function is

m(n,k,s)=max⁡{∣F∣:F⊆([n]k), ν(F)≤s}.m(n,k,s)=\max\Big\{|\mathcal F| : \mathcal F\subseteq\tbinom{[n]}{k},\ \nu(\mathcal F)\le s\Big\}.m(n,k,s)=max{∣F∣:F⊆(k[n]​), ν(F)≤s}.

Two families show the conjectured value. The family of all kkk-sets meeting [s][s][s] has (nk)−(n−sk)\binom nk-\binom{n-s}k(kn​)−(kn−s​) members; the family of all kkk-subsets of [k(s+1)−1][k(s+1)-1][k(s+1)−1] has (k(s+1)−1k)\binom{k(s+1)-1}k(kk(s+1)−1​) members. Both have ν≤s\nu\le sν≤s, and the EMC asserts m(n,k,s)m(n,k,s)m(n,k,s) is the larger of the two numbers. For n≥(k+1)sn\ge(k+1)sn≥(k+1)s the first is larger.

The proof uses the shifting order: for A={a1<⋯<ak}A=\{a_1<\dots<a_k\}A={a1​<⋯<ak​} and B={b1<⋯<bk}B=\{b_1<\dots<b_k\}B={b1​<⋯<bk​}, A≺BA\prec BA≺B if ai≤bia_i\le b_iai​≤bi​ for all iii and A≠BA\ne BA=B. A family is initial if it is closed downward under ≺\prec≺. For S⊆[s+1]S\subseteq[s+1]S⊆[s+1], F(S)={F∖S:F∈F, F∩[s+1]=S}\mathcal F(S)=\{F\setminus S: F\in\mathcal F,\ F\cap[s+1]=S\}F(S)={F∖S:F∈F, F∩[s+1]=S}, and ∂\partial∂ denotes the shadow. Families F1,…,Fs+1\mathcal F_1,\dots,\mathcal F_{s+1}F1​,…,Fs+1​ are cross-dependent if no choice Fi∈FiF_i\in\mathcal F_iFi​∈Fi​ is pairwise disjoint, and nested if F1⊇⋯⊇Fs+1\mathcal F_1\supseteq\dots\supseteq\mathcal F_{s+1}F1​⊇⋯⊇Fs+1​. A random ttt-matching is a uniformly random ordered ttt-tuple of pairwise disjoint lll-subsets of [m][m][m], and η=∣G∩B∣\eta=|\mathcal G\cap\mathcal B|η=∣G∩B∣ counts how many of its sets lie in a fixed family G\mathcal GG of density α=∣G∣/(ml)\alpha=|\mathcal G|/\binom mlα=∣G∣/(lm​).

Formalization targets

Goal: Theorem 1

There is an absolute constant s0s_0s0​ such that for all k≥1k\ge1k≥1, s≥s0s\ge s_0s≥s0​ and

n≥53sk−23swe havem(n,k,s)=(nk)−(n−sk).n\ge\tfrac53sk-\tfrac23s\qquad\text{we have}\qquad m(n,k,s)=\binom nk-\binom{n-s}k .n≥35​sk−32​swe havem(n,k,s)=(kn​)−(kn−s​).

The constant s0s_0s0​ is existential and uniform in nnn and kkk; no value is fixed, so any improvement of the proof keeps the statement valid.

Stronger form: Theorem 14

For every ε>0\varepsilon>0ε>0 there is s0(ε)s_0(\varepsilon)s0​(ε) such that the same equality holds for all s≥s0s\ge s_0s≥s0​, k≥1k\ge1k≥1 and n≥s+(1.666+ε)s(k−1)n\ge s+(1.666+\varepsilon)s(k-1)n≥s+(1.666+ε)s(k−1). Theorem 1 follows by taking ε<53−1.666\varepsilon<\frac53-1.666ε<35​−1.666.

Milestones

Following the paper's proof: Lemma 3 (shifting), Proposition 4, Lemma 5, Proposition 6, Corollary 7 and Lemma 8 (structure of initial families and their shadows); Proposition 11, Theorem 12 and Proposition 13 (concentration of η\etaη for random matchings); Lemma 18 and Lemma 15 (the weighted bound for cross-dependent nested families); Lemmas 16 and 17 (the induction step at n=s+(1.666+ε)s(k−1)n=s+(1.666+\varepsilon)s(k-1)n=s+(1.666+ε)s(k−1)); Theorem 14.

Significance

The theorem extends the range in which the EMC is known from n≥(2s+1)k−sn\ge(2s+1)k-sn≥(2s+1)k−s to n≥53sk−23sn\ge\frac53sk-\frac23sn≥35​sk−32​s for large sss, settling roughly a third of the remaining range. The paper uses it as a black box to derive a universal upper bound on m(n,k,s)m(n,k,s)m(n,k,s) below that range (its Theorem 2) and consequences for Dirac thresholds. The concentration inequality of Theorem 12, a Gaussian tail for the number of members of a fixed family hit by a random matching, is a tool of independent use and has since been applied to rainbow versions of the problem (Kupavskii, arXiv:2104.08083).

The result is proved on paper; this mission formalizes it. No part of the argument has a machine-checked proof: Mathlib has shadows and the Erdős–Ko–Rado theorem, and the platform has Erdős–Ko–Rado for s=1s=1s=1, but there is no formal theory of the matching number, shifted families, Kneser graph spectra, or martingale concentration for random matchings. A complete formalization would make the EMC in this range, and the concentration theorem, available for reuse.

Difficulty

Averaging over a random full partition of [n][n][n] into kkk-sets gives only m(n,k,s)≤s(n−1k−1)m(n,k,s)\le s\binom{n-1}{k-1}m(n,k,s)≤s(k−1n−1​), far from the truth: the expected number of partition classes in F\mathcal FF says nothing about how that number is distributed. The paper's step is to show the count is concentrated (Theorem 12) and to exploit the deterministic bound of Lemma 18, which penalizes matchings with many classes in Fs+1\mathcal F_{s+1}Fs+1​. Controlling the regime where the density α\alphaα is small needs the separate comparison of Proposition 13.

The second difficulty is Lemma 17, whose proof in the appendix is a delicate estimate on sums and products of binomial coefficients over all k≥4k\ge4k≥4, supported by numerical computations done in Mathematica. A formal proof needs certified numerics for these finite checks and a separate stability argument for k>2⋅104k>2\cdot10^4k>2⋅104. The case k=3k=3k=3 is an external base case (Frankl 2017), so the induction on kkk also needs that result or another route.

Formalization scope

Sets are finite sets of natural numbers; [n][n][n] is Finset.Icc 1 n, so the paper's indices such as [i(s+1)−1][i(s+1)-1][i(s+1)−1] and s+1,2(s+1),…s+1,2(s+1),\dotss+1,2(s+1),… appear unshifted. ν\nuν is a maximum over subfamilies (members are distinct), and m(n,k,s)m(n,k,s)m(n,k,s) is a finite maximum, always attained. Initial families are closed downward among kkk-subsets of [m][m][m] only. Random matchings are ordered tuples, and probabilities, expectations and covariances are uniform averages over the finite sample space. The constant 1.6661.6661.666 is the exact decimal, not 5/35/35/3. The paper omits integer parts at n=s+(c+ε)s(k−1)n=s+(c+\varepsilon)s(k-1)n=s+(c+ε)s(k−1); the formalization rounds nnn up. Where the paper leaves hypotheses implicit, they are binders: k≥2k\ge2k≥2 in Corollary 7, Lemma 8 and Lemma 16, k≥4k\ge4k≥4 and the induction hypothesis in Lemma 17, t≥1t\ge1t≥1 in Theorem 12, and q>0q>0q>0 (the division sx/qsx/qsx/q) in Lemma 15.

The goal is the equality m(n,k,s)=(nk)−(n−sk)m(n,k,s)=\binom nk-\binom{n-s}km(n,k,s)=(kn​)−(kn−s​); exhibiting the family of kkk-sets meeting [s][s][s] proves only the lower bound and does not close it.

Useful infrastructure, reusable beyond this mission: shifting and the compression argument (Lemma 3), the shadow bounds of Section 2, the expander mixing lemma and the second eigenvalue of Kneser graphs, and the Azuma–Hoeffding inequality for the exposure martingale of a random matching. Contributions of any of these, and of alternative proofs of the milestones, are welcome.

Selected references

  • P. Frankl, A. Kupavskii, The Erdős Matching Conjecture and concentration inequalities, J. Combin. Theory Ser. B (2022); arXiv:1806.08855v3. https://arxiv.org/abs/1806.08855, https://doi.org/10.1016/j.jctb.2022.08.002
  • P. Erdős, A problem on independent r-tuples, Ann. Univ. Sci. Budapest. Eötvös Sect. Math. 8 (1965), 93–95.
  • P. Frankl, Improved bounds for Erdős' Matching Conjecture, J. Combin. Theory Ser. A 120 (2013), 1068–1072. https://doi.org/10.1016/j.jcta.2013.01.008
  • P. Frankl, On the maximum number of edges in a hypergraph with given matching number, Discrete Appl. Math. 216 (2017), 562–581.
  • H. Huang, P.-S. Loh, B. Sudakov, The size of a hypergraph and its matching number, Combin. Probab. Comput. 21 (2012), 442–450.
  • N. Alon, F. Chung, Explicit construction of linear sized tolerant networks, Discrete Math. 72 (1988), 15–19. https://doi.org/10.1016/0012-365X(88)90189-6
  • L. Lovász, On the Shannon capacity of a graph, IEEE Trans. Inform. Theory 25 (1979), 1–7. https://doi.org/10.1109/TIT.1979.1055985
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Competitive Paging Algorithms IV: An Algorithm Competitive against Several Others Exists iff the Reciprocal Ratios Sum to at Most 1Research Paper

Motivation

Paging is the problem of managing a fast memory that holds kkk pages out of nnn: when a requested page is not in fast memory (a page fault), some resident page must be evicted, and the cost of an algorithm is its number of faults. Practitioners have many eviction rules. Least-recently-used (LRU) performs well on real workloads but can be kkk times worse than the optimal off-line schedule; the randomized marking algorithm of the same paper is 2Hk2H_k2Hk​-competitive and so has better worst-case guarantees. Fiat, Karp, Luby, McGeoch, Sleator and Young asked in 1991 whether one on-line algorithm can combine the advantages of several given ones, and answered the question exactly: the attainable combinations of ratios are characterized by one inequality (arXiv:cs/0205038, §6).

The question of combining on-line algorithms has since become a theme of its own: combining heuristics with worst-case-safe algorithms, and, more recently, combining machine-learned predictions with robust fallbacks, both ask for the same kind of guarantee against several reference algorithms at once.

Setting

A type (k,n)(k,n)(k,n) consists of kkk servers and a finite set MMM of nnn vertices with the uniform metric: two distinct vertices are at distance 111. This is paging: vertices are pages, the vertices covered by servers are the pages in fast memory, and a server move is a page fault.

A deterministic on-line algorithm AAA of type (k,n)(k,n)(k,n) has an initial configuration of its kkk servers and, after each request r∈Mr\in Mr∈M, moves servers so that some server covers rrr; its configuration after a request sequence depends only on that sequence. Its cost CA(σ)C_A(\sigma)CA​(σ) on a request sequence σ\sigmaσ is the total distance its servers travel, i.e. the number of server moves.

For algorithms AAA and BBB of the same type and a constant ccc, AAA is ccc-competitive against BBB if there is a constant aaa such that for every request sequence σ\sigmaσ

CA(σ)≤c⋅CB(σ)+a.C_A(\sigma)\le c\cdot C_B(\sigma)+a .CA​(σ)≤c⋅CB​(σ)+a.

A sequence c∗=(c(1),…,c(m))c^*=(c(1),\dots,c(m))c∗=(c(1),…,c(m)) of positive reals is realizable if for every type (k,n)(k,n)(k,n) and every mmm deterministic on-line algorithms B(1),…,B(m)B(1),\dots,B(m)B(1),…,B(m) of that type there is a deterministic on-line algorithm AAA of the same type that is c(i)c(i)c(i)-competitive against B(i)B(i)B(i) for every iii.

Formalization targets

Goal: Theorem 6

For m≥1m\ge1m≥1 and positive reals c(1),…,c(m)c(1),\dots,c(m)c(1),…,c(m),

c∗ is realizable  ⟺  ∑1≤i≤m1c(i)≤1.c^*\ \text{is realizable}\iff \sum_{1\le i\le m}\frac1{c(i)}\le 1 .c∗ is realizable⟺1≤i≤m∑​c(i)1​≤1.

Milestones

In the order of the paper's proof:

  1. Punishments are paid for. If AAA punishes BBB at a time step (an AAA-interval on a vertex vvv ends at that step and contains the end of a BBB-interval on vvv that began no later), then BBB has moved a server; the number of such steps is at most CB(σ)C_B(\sigma)CB​(σ).
  2. A fault leaves room to punish. If ∣SA∣=k|S_A|=k∣SA​∣=k, ∣SB∣≤k|S_B|\le k∣SB​∣≤k, x∈SBx\in S_Bx∈SB​ and x∉SAx\notin S_Ax∈/SA​, then some u∈SAu\in S_Au∈SA​ is not in SBS_BSB​.
  3. The greedy quota claim. If ∑i1/c(i)≤1\sum_i 1/c(i)\le 1∑i​1/c(i)≤1 and each unit of cost punishes the B(i)B(i)B(i) minimizing c(i)(PUN(i)+1)c(i)(\mathrm{PUN}(i)+1)c(i)(PUN(i)+1) (other algorithms may be punished incidentally), then after cost rrr every B(i)B(i)B(i) has been punished at least ⌊r/c(i)⌋\lfloor r/c(i)\rfloor⌊r/c(i)⌋ times.
  4. Shuttle algorithms. With 2m−12m-12m−1 servers on 2m2m2m vertices there are mmm algorithms, each keeping all vertices outside its own pair covered, no two of which move at the same step; in particular their total cost on any σ\sigmaσ is at most ∣σ∣|\sigma|∣σ∣.
  5. A forcing adversary. With 2m−12m-12m−1 servers on 2m2m2m vertices every algorithm can be forced to move at each of NNN steps, so CA(τ(N))≥NC_A(\tau(N))\ge NCA​(τ(N))≥N.

Significance

The result. Theorem 6 is an exact characterization, not a bound: the region of simultaneously attainable ratios against arbitrary deterministic paging algorithms is {c:∑1/c(i)≤1}\{c:\sum 1/c(i)\le 1\}{c:∑1/c(i)≤1}. For example, any two paging algorithms can be combined into one that is 222-competitive against each, and no better symmetric pair is possible in general. Combined with Theorem 7 of the same paper (not part of this mission), the same region is attainable against randomized algorithms, which is how LRU's practical behaviour and the marking algorithm's 2Hk2H_k2Hk​ worst-case guarantee can be obtained within constant factors by one algorithm.

Formalizing it. The theorem has been proved since 1991; no machine-checked proof is known. A formal proof produces a reusable notion of competitiveness of one on-line algorithm against another, built on the published KServer_model definitions, and a formal account of the scheduling fact at the core of the sufficiency proof.

Difficulty

Sufficiency looks like an averaging argument, but the combined algorithm cannot simulate the B(i)B(i)B(i) and follow one of them: switching between their configurations costs up to kkk per switch, which no additive constant absorbs. The accounting has to charge each of AAA's faults to a specific move of a specific B(i)B(i)B(i), and the charge must be injective; the paper's claim that CB(σ)C_B(\sigma)CB​(σ) is at least the number of punishments is where this happens, and it depends on how server intervals are matched. The allocation of faults to algorithms is then a deadline-scheduling problem whose feasibility is exactly ∑1/c(i)≤1\sum 1/c(i)\le 1∑1/c(i)≤1, and the floor functions make the counting delicate at the boundary. The paper's own definition of punishment only counts intervals that start with a move, so the first kkk faults of AAA (servers on their initial vertices) need separate treatment; they are absorbed by the additive constant.

Necessity needs the right family of hard instances: the mmm algorithms must never move at the same step, which pins the type to (2m−1,2m)(2m-1,2m)(2m−1,2m).

Formalization scope

The Lean development works in the namespace CompetitivePaging.Combining and imports the published KServer_model definitions: KServer.OnlineAlgorithm k M (a configuration map from request prefixes to Fin k → M with a serving condition) and OnlineAlgorithm.cost. Committed conventions:

  • a type (k,n)(k,n)(k,n) is any k : ℕ and any finite M : Type with a metric in which distinct points are at distance 111; realizability quantifies over all of them, never over one fixed type;
  • servers are labelled; each algorithm has its own initial configuration, and the additive constant aaa is chosen before the request sequence;
  • c(i)>0c(i)>0c(i)>0 and m≥1m\ge1m≥1 are hypotheses of the goal, as in the paper; without positivity, 1/0=01/0=01/0=0 in Lean would make a zero ratio free;
  • time ttt is the step processing the ttt-th request; the paper's PUN\mathrm{PUN}PUN counts time steps.

Trivializing encodings are ruled out: realizability is not stated for a single fixed type, the metric is not the metric of Fin n, and the competitive constant is not allowed to depend on the request sequence.

A complete proof needs the construction of the punishing algorithm as a KServer.OnlineAlgorithm (a lazy, injective algorithm whose moves depend on the prefix and on the B(i)B(i)B(i)'s configurations), the injective charging argument, the scheduling lemma, and the explicit shuttle algorithms. The scheduling lemma and the charging lemma are independent of paging and reusable. Proofs of any milestone are welcome, as are alternative statements of the sufficiency construction.

Selected references

  • A. Fiat, R. M. Karp, M. Luby, L. A. McGeoch, D. D. Sleator, N. E. Young, Competitive Paging Algorithms, J. Algorithms 12(4):685–699, 1991. doi:10.1016/0196-6774(91)90041-V; preprint arXiv:cs/0205038.
  • D. D. Sleator, R. E. Tarjan, Amortized efficiency of list update and paging rules, Comm. ACM 28(2):202–208, 1985. doi:10.1145/2786.2793
  • M. S. Manasse, L. A. McGeoch, D. D. Sleator, Competitive algorithms for server problems, J. Algorithms 11(2):208–230, 1990. doi:10.1016/0196-6774(90)90003-W
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Robust Solutions to Least-Squares Problems with Uncertain Data I: The Worst-Case Residual and Its Unique MinimizerResearch Paper

Motivation

The least-squares (LS) problem min⁡x∥Ax−b∥\min_x \|Ax - b\|minx​∥Ax−b∥ assumes that the data A∈Rn×mA \in \mathbb{R}^{n\times m}A∈Rn×m, b∈Rnb \in \mathbb{R}^nb∈Rn are exact. In applications they rarely are: they come from measurements, from linearizations, or from models with neglected dynamics. A classical response is sensitivity analysis or regularization (Tikhonov), where a weight trades the size of the solution against the fit, and the choice of that weight is left to the user. El Ghaoui and Lebret (SIAM J. Matrix Anal. Appl. 18(4), 1997) take a deterministic view instead: the true data lie in a known ball around (A,b)(A, b)(A,b), and the solution should minimize the residual it can be forced to have in the worst case over that ball. The paper shows that this robust least-squares (RLS) problem is solvable exactly, in the unstructured case by a second-order cone program (SOCP). The same worst-case idea, applied to regression, underlies the later equivalence between robustness and regularization (Xu, Caramanis and Mannor, 2009) and is a standard entry point to robust optimization (Ben-Tal, El Ghaoui and Nemirovski, Robust Optimization, 2009).

This mission formalizes the first main result of the paper, Theorem 3.1: the worst-case residual has a closed form, its minimizer is unique, and minimizing it is an SOCP.

Setting

Vectors carry the Euclidean norm ∥v∥=(∑ivi2)1/2\|v\| = (\sum_i v_i^2)^{1/2}∥v∥=(∑i​vi2​)1/2. For a matrix XXX, ∥X∥F=(∑i,jXij2)1/2\|X\|_F = (\sum_{i,j} X_{ij}^2)^{1/2}∥X∥F​=(∑i,j​Xij2​)1/2 is the Frobenius norm and ∥X∥\|X\|∥X∥ the largest singular value, i.e. the smallest c≥0c \ge 0c≥0 with ∥Xv∥≤c∥v∥\|Xv\| \le c\|v\|∥Xv∥≤c∥v∥ for all vvv.

Fix A∈Rn×mA \in \mathbb{R}^{n\times m}A∈Rn×m and b∈Rnb \in \mathbb{R}^nb∈Rn. A perturbation is a pair ΔA∈Rn×m\Delta A \in \mathbb{R}^{n\times m}ΔA∈Rn×m, Δb∈Rn\Delta b \in \mathbb{R}^nΔb∈Rn, collected in the augmented matrix Δ=[ΔA Δb]∈Rn×(m+1)\Delta = [\Delta A\ \Delta b] \in \mathbb{R}^{n\times(m+1)}Δ=[ΔA Δb]∈Rn×(m+1). For a bound ρ≥0\rho \ge 0ρ≥0 and x∈Rmx \in \mathbb{R}^mx∈Rm, the worst-case residual is (paper, eq. (1))

r(A,b,ρ,x)=max⁡∥[ΔA Δb]∥F≤ρ∥(A+ΔA)x−(b+Δb)∥,r(A,b,\rho,x) = \max_{\|[\Delta A\ \Delta b]\|_F \le \rho} \|(A+\Delta A)x - (b+\Delta b)\|,r(A,b,ρ,x)=∥[ΔA Δb]∥F​≤ρmax​∥(A+ΔA)x−(b+Δb)∥,

and xxx is an RLS solution if it minimizes r(A,b,ρ,⋅)r(A,b,\rho,\cdot)r(A,b,ρ,⋅). The bound constrains the augmented matrix jointly, not ΔA\Delta AΔA and Δb\Delta bΔb separately. The paper normalizes ρ=1\rho = 1ρ=1 and writes r(A,b,x)=r(A,b,1,x)r(A,b,x) = r(A,b,1,x)r(A,b,x)=r(A,b,1,x). Finally, [x;1]∈Rm+1[x;1] \in \mathbb{R}^{m+1}[x;1]∈Rm+1 denotes xxx stacked over 111. In the Lean development these are RobustLS.Unstructured.eucNorm, frobNorm, specNorm, augment, stackOne, worstCaseResidual A b ρ x, its largest-singular-value variant worstCaseResidualSpec, and the SOCP constraint predicate SocpFeasible A b x λ τ.

Formalization targets

Goal: Theorem 3.1 (p. 1040)

For n≥1n \ge 1n≥1, every AAA, bbb:

r(A,b,x)=∥Ax−b∥+∥x∥2+1for all x∈Rm,r(A,b,x) = \|Ax-b\| + \sqrt{\|x\|^2+1} \quad \text{for all } x \in \mathbb{R}^m,r(A,b,x)=∥Ax−b∥+∥x∥2+1​for all x∈Rm,

the problem min⁡x∈Rmr(A,b,x)\min_{x \in \mathbb{R}^m} r(A,b,x)minx∈Rm​r(A,b,x) has exactly one solution xRLSx_{\mathrm{RLS}}xRLS​, and it is the SOCP

minimize λsubject to∥Ax−b∥≤λ−τ,∥[x;1]∥≤τ,(15)\text{minimize } \lambda \quad\text{subject to}\quad \|Ax-b\| \le \lambda-\tau,\quad \|[x;1]\| \le \tau, \tag{15}minimize λsubject to∥Ax−b∥≤λ−τ,∥[x;1]∥≤τ,(15)

in the sense that r(A,b,x)r(A,b,x)r(A,b,x) is the least λ\lambdaλ for which some τ\tauτ makes (x,λ,τ)(x,\lambda,\tau)(x,λ,τ) feasible.

Milestones

  1. Eq. (16). Every perturbation with ∥[ΔA Δb]∥F≤1\|[\Delta A\ \Delta b]\|_F \le 1∥[ΔA Δb]∥F​≤1 has residual at most ∥Ax−b∥+∥x∥2+1\|Ax-b\| + \sqrt{\|x\|^2+1}∥Ax−b∥+∥x∥2+1​.
  2. The worst-case perturbation. For a unit vector uuu aligned with Ax−bAx - bAx−b (arbitrary if Ax=bAx = bAx=b), the rank-one matrix Δ=u[xT −1]/∥x∥2+1\Delta = u[x^T\ {-1}]/\sqrt{\|x\|^2+1}Δ=u[xT −1]/∥x∥2+1​ has ∥Δ∥F=∥Δ∥=1\|\Delta\|_F = \|\Delta\| = 1∥Δ∥F​=∥Δ∥=1 and attains the bound.
  3. Spectral norm. The worst case over the larger ball ∥[ΔA Δb]∥≤1\|[\Delta A\ \Delta b]\| \le 1∥[ΔA Δb]∥≤1 is the same value.
  4. Strict convexity. x↦r(A,b,x)x \mapsto r(A,b,x)x↦r(A,b,x) is strictly convex on Rm\mathbb{R}^mRm.
  5. The SOCP (15). For every xxx, r(A,b,x)r(A,b,x)r(A,b,x) is the optimal λ\lambdaλ of (15) with xxx fixed, and xxx is an RLS solution exactly when it is the xxx-part of an optimal solution of (15).

Significance

The closed form replaces a maximization over a matrix ball of dimension n(m+1)n(m+1)n(m+1) by two Euclidean norms. It shows that the RLS objective is the LS residual plus a penalty ∥x∥2+1\sqrt{\|x\|^2+1}∥x∥2+1​ that does not depend on AAA or bbb, which is the starting point for the paper's Theorem 3.2 (the RLS solution is a Tikhonov-regularized LS solution with a data-dependent weight) and its analysis of continuity and conditioning. The SOCP formulation places the problem in the class solved by interior-point methods, at a cost the paper compares with one singular value decomposition of AAA. The spectral-norm statement says the worst case does not depend on which of the two standard matrix norms bounds the perturbation.

The result is proved in the paper; the proof is short. To the best of the planning survey (September 2026), no machine-checked proof exists, and Prove2Me has no statement about worst-case residuals or robust least squares. The mission produces a verified closed form that later missions of this series (Tikhonov form of the solution, structured and linear-fractional perturbations) and any formalization of robust regression can import.

Difficulty

The upper bound alone does not give the theorem: the statement is an equality, and the equality needs an explicit maximizer. The paper's printed maximizer is wrong by a sign: with [xT 1][x^T\ 1][xT 1] in place of [xT −1][x^T\ {-1}][xT −1] the perturbation does not attain the bound (for A=0A = 0A=0, x=0x = 0x=0, b=e1b = e_1b=e1​ it gives residual 000 instead of 222), so a transcription of the printed proof fails. Two further points are silent in the paper. The operator norm of a rank-one matrix has to be computed from the definition of the largest singular value. Uniqueness of the minimizer needs existence first, which follows from growth of rrr at infinity and is not stated. Working with the sSup definition of the worst case requires showing the set of residuals is bounded, which is milestone 1.

Formalization scope

  • Dimensions are Fin n, Fin m; AAA is Matrix (Fin n) (Fin m) ℝ, bbb and xxx are functions Fin n → ℝ, Fin m → ℝ. The augmented matrix [ΔA Δb][\Delta A\ \Delta b][ΔA Δb] is indexed by Fin m ⊕ Unit, and so is [x;1][x;1][x;1].
  • Vector norms are the Euclidean norm written as ∑ivi2\sqrt{\sum_i v_i^2}∑i​vi2​​ (eucNorm), never Mathlib's ‖·‖ on Fin n → ℝ, which is the sup norm. The Frobenius norm and the largest singular value are explicit definitions (frobNorm, specNorm); specNorm is the infimum of admissible operator constants.
  • The maximum in (1) is sSup of the set of attained residuals. For ρ≥0\rho \ge 0ρ≥0 the set is nonempty and bounded, so this is the true maximum; milestones 1 and 2 state the bound and the attaining perturbation directly, so no statement relies on the value of sSup on an unbounded set.
  • The paper's normalization ρ=1\rho = 1ρ=1 is kept; general ρ>0\rho > 0ρ>0 follows from the scaling ϕ(A,b,ρ)=ρ ϕ(A/ρ,b/ρ,1)\phi(A,b,\rho) = \rho\,\phi(A/\rho,b/\rho,1)ϕ(A,b,ρ)=ρϕ(A/ρ,b/ρ,1) the paper records on p. 1039 and is not a target.
  • The goal assumes n≥1n \ge 1n≥1. For n=0n = 0n=0 the only perturbation is the empty matrix, the worst case is 000, and the closed form fails; the paper's setting (Ax≃bAx \simeq bAx≃b with data b∈Rnb \in \mathbb{R}^nb∈Rn) has n≥1n \ge 1n≥1. Milestones 3–5 carry the same hypothesis.
  • Milestone 2 states the corrected perturbation [xT −1][x^T\ {-1}][xT −1]; the printed [xT 1][x^T\ 1][xT 1] is false.
  • A trivializing formalization — an upper bound in place of the equality, a worst case over ΔA\Delta AΔA and Δb\Delta bΔb bounded separately, or uniqueness among critical points only — is ruled out: the goal is the equality for the jointly bounded augmented matrix and ∃! of a global minimizer over all of Rm\mathbb{R}^mRm.

Contributions welcome: lemmas on Frobenius and operator norms of rank-one matrices, the inequality ∥Mz∥≤∥M∥F∥z∥\|Mz\| \le \|M\|_F\|z\|∥Mz∥≤∥M∥F​∥z∥ in this explicit setting, and strict convexity of x↦∥x∥2+1x \mapsto \sqrt{\|x\|^2+1}x↦∥x∥2+1​; these are reusable beyond the mission.

Selected references

  • L. El Ghaoui and H. Lebret, Robust Solutions to Least-Squares Problems with Uncertain Data, SIAM Journal on Matrix Analysis and Applications 18(4):1035–1064, 1997. https://doi.org/10.1137/S0895479896298130
  • A. Ben-Tal, L. El Ghaoui and A. Nemirovski, Robust Optimization, Princeton University Press, 2009. https://doi.org/10.1515/9781400831050
  • H. Xu, C. Caramanis and S. Mannor, Robust Regression and Lasso, Journal of Machine Learning Research 10:1485–1510, 2009 (IEEE Trans. Inf. Theory 56(7), 2010). https://jmlr.org/papers/v10/xu09b.html
  • M. S. Lobo, L. Vandenberghe, S. Boyd and H. Lebret, Applications of Second-Order Cone Programming, Linear Algebra and its Applications 284:193–228, 1998. https://doi.org/10.1016/S0024-3795(98)10032-0
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Robust Solutions to Least-Squares Problems with Uncertain Data II: Robust Least Squares as Tikhonov RegularizationResearch Paper

Motivation

Least squares fits a linear model Ax≃bAx \simeq bAx≃b by minimizing ∥Ax−b∥\|Ax - b\|∥Ax−b∥, and its solution can be extremely sensitive to errors in the data (A,b)(A, b)(A,b) when AAA is ill-conditioned. The standard remedy is Tikhonov regularization (ridge regression): minimize ∥Ax−b∥2+μ∥x∥2\|Ax - b\|^2 + \mu\|x\|^2∥Ax−b∥2+μ∥x∥2, whose solution x=(A⊤A+μI)−1A⊤bx = (A^\top A + \mu I)^{-1}A^\top bx=(A⊤A+μI)−1A⊤b is stable but depends on a parameter μ>0\mu > 0μ>0 that must be chosen by some external rule.

El Ghaoui and Lebret (SIAM J. Matrix Anal. Appl. 18(4), 1997) proposed instead to take the uncertainty in (A,b)(A, b)(A,b) seriously: the robust least-squares (RLS) solution minimizes the worst-case residual over all perturbations [ΔA Δb][\Delta A\ \Delta b][ΔA Δb] of Frobenius norm at most ρ\rhoρ. Their Theorem 3.1 shows that for ρ=1\rho = 1ρ=1 this worst-case residual equals ∥Ax−b∥+∥x∥2+1\|Ax - b\| + \sqrt{\|x\|^2 + 1}∥Ax−b∥+∥x∥2+1​ and that its minimization is the second-order cone program (15). Theorem 3.2, the subject of this mission, reads off the optimal solution: it is a Tikhonov-regularized solution, and the regularization parameter is not a free choice but is fixed by the data. This gives a principled answer to the question of how to choose μ\muμ, and it is the reason the paper describes RLS as "a Tikhonov regularization procedure" with "a rigorous way to compute the regularization parameter" (abstract, p. 1035).

A closely related model for least squares with bounded data uncertainty was developed at the same time by Chandrasekaran, Golub, Gu and Sayed; the paper notes that their preliminary draft (its reference [5]) gives a solution to the unstructured RLS problem similar to that of §3.2 (pp. 1036–1037).

Setting

Throughout, A∈Rn×mA \in \mathbb R^{n\times m}A∈Rn×m, b∈Rnb \in \mathbb R^nb∈Rn, x∈Rmx \in \mathbb R^mx∈Rm, and every vector norm is Euclidean, ∥v∥=∑ivi2\|v\| = \sqrt{\sum_i v_i^2}∥v∥=∑i​vi2​​. For x∈Rmx \in \mathbb R^mx∈Rm, [x;1]∈Rm+1[x; 1] \in \mathbb R^{m+1}[x;1]∈Rm+1 is xxx with a coordinate 111 appended, so ∥[x;1]∥=∥x∥2+1\|[x;1]\| = \sqrt{\|x\|^2 + 1}∥[x;1]∥=∥x∥2+1​.

The SOCP (15) is the problem, in the variables x∈Rmx \in \mathbb R^mx∈Rm and λ,τ∈R\lambda, \tau \in \mathbb Rλ,τ∈R,

minimize λsubject to∥Ax−b∥≤λ−τ,∥[x;1]∥≤τ.\text{minimize } \lambda \quad\text{subject to}\quad \|Ax - b\| \le \lambda - \tau,\qquad \|[x;1]\| \le \tau.minimize λsubject to∥Ax−b∥≤λ−τ,∥[x;1]∥≤τ.

A triple (x,λ,τ)(x, \lambda, \tau)(x,λ,τ) is optimal for (15) if it is feasible and λ≤λ′\lambda \le \lambda'λ≤λ′ for every feasible (x′,λ′,τ′)(x', \lambda', \tau')(x′,λ′,τ′). Its dual, derived in the paper from the general second-order cone duality of §2.1, is the problem in z∈Rnz \in \mathbb R^nz∈Rn, u∈Rmu \in \mathbb R^mu∈Rm, v∈Rv \in \mathbb Rv∈R

maximize b⊤z−vsubject toA⊤z+u=0,∥z∥≤1,∥[u;v]∥≤1.\text{maximize } b^\top z - v \quad\text{subject to}\quad A^\top z + u = 0,\quad \|z\| \le 1,\quad \|[u; v]\| \le 1.maximize b⊤z−vsubject toA⊤z+u=0,∥z∥≤1,∥[u;v]∥≤1.

The minimum-norm solution of Ax=bAx = bAx=b is a solution xxx with ∥x∥≤∥y∥\|x\| \le \|y\|∥x∥≤∥y∥ for every other solution yyy; when Ax=bAx = bAx=b is consistent it is A†bA^\dagger bA†b, with A†A^\daggerA† the Moore–Penrose pseudoinverse.

In the Lean development these objects are IsSOCPFeasible, IsSOCPOptimal, IsDualFeasible, dualObjective, IsDualOptimal and IsMinNormSolution, in the namespace RobustLS.Tikhonov, with the Euclidean norm eucNorm.

Formalization targets

Goal: Theorem 3.2 with the identity for μ\muμ

Let (x,λ,τ)(x, \lambda, \tau)(x,λ,τ) be optimal for (15) and set μ=(λ−τ)/τ\mu = (\lambda - \tau)/\tauμ=(λ−τ)/τ. Then

x={(μI+A⊤A)−1A⊤bif μ>0,A†belse,andμ=∥Ax−b∥∥x∥2+1.x = \begin{cases} (\mu I + A^\top A)^{-1}A^\top b & \text{if } \mu > 0,\\ A^\dagger b & \text{else,}\end{cases}\qquad\text{and}\qquad \mu = \frac{\|Ax - b\|}{\sqrt{\|x\|^2 + 1}}.x={(μI+A⊤A)−1A⊤bA†b​if μ>0,else,​andμ=∥x∥2+1​∥Ax−b∥​.

By Theorem 3.1 (the subject of the companion mission I of this series), the xxx-part of an optimal point of (15) is the RLS solution for ρ=1\rho = 1ρ=1, so this is formula (17) of the paper. The identity for μ\muμ is the final display of the paper's proof and is the claim in the mission's title.

Milestones (in the order of the paper's proof, p. 1041)

  1. Both (15) and its dual have optimal points.
  2. If λ=τ\lambda = \tauλ=τ at the optimum, then Ax=bAx = bAx=b and λ=τ=∥x∥2+1\lambda = \tau = \sqrt{\|x\|^2 + 1}λ=τ=∥x∥2+1​.
  3. In that case xxx is the minimum-norm solution of Ax=bAx = bAx=b, x=A†bx = A^\dagger bx=A†b.
  4. Eq. (18): for λ>τ\lambda > \tauλ>τ, primal and dual optimal values coincide,
∥Ax−b∥+∥[x;1]∥=λ=b⊤z−v=−(Ax−b)⊤z−[x⊤ 1][−A⊤zv].\|Ax - b\| + \|[x;1]\| = \lambda = b^\top z - v = -(Ax-b)^\top z - [x^\top\ 1]\begin{bmatrix} -A^\top z\\ v\end{bmatrix}.∥Ax−b∥+∥[x;1]∥=λ=b⊤z−v=−(Ax−b)⊤z−[x⊤ 1][−A⊤zv​].
  1. The dual optimal point is z=−(Ax−b)/∥Ax−b∥z = -(Ax - b)/\|Ax - b\|z=−(Ax−b)/∥Ax−b∥, [u;v]=−[x;1]/∥x∥2+1[u; v] = -[x; 1]/\sqrt{\|x\|^2 + 1}[u;v]=−[x;1]/∥x∥2+1​.
  2. Substituting into A⊤z+u=0A^\top z + u = 0A⊤z+u=0: x=(A⊤A+μI)−1A⊤bx = (A^\top A + \mu I)^{-1}A^\top bx=(A⊤A+μI)−1A⊤b with μ=(λ−τ)/τ=∥Ax−b∥/∥x∥2+1\mu = (\lambda - \tau)/\tau = \|Ax - b\|/\sqrt{\|x\|^2 + 1}μ=(λ−τ)/τ=∥Ax−b∥/∥x∥2+1​.

A further item states Remark 3.1: for λ>τ\lambda > \tauλ>τ, xxx is the unique minimizer of the weighted residual ∥[A;I;0]y−[b;0;1]∥Θ\big\|[A; I; 0]y - [b; 0; 1]\big\|_\Theta​[A;I;0]y−[b;0;1]​Θ​ with Θ=diag((λ−τ)I,τI,τ)\Theta = \mathbf{diag}((\lambda-\tau)I, \tau I, \tau)Θ=diag((λ−τ)I,τI,τ) and ∥r∥Θ=∥Θ−1/2r∥\|r\|_\Theta = \|\Theta^{-1/2} r\|∥r∥Θ​=∥Θ−1/2r∥.

Significance

The result. Theorem 3.2 turns a robust optimization problem into a familiar linear-algebra object. It says that the robust solution always lies on the Tikhonov path {(A⊤A+μI)−1A⊤b:μ>0}\{(A^\top A + \mu I)^{-1}A^\top b : \mu > 0\}{(A⊤A+μI)−1A⊤b:μ>0} or at its endpoint A†bA^\dagger bA†b, and it identifies the point on the path through a fixed-point equation relating μ\muμ to the residual and the size of the solution. The paper builds on this in §3.3 (a one-dimensional search for μ\muμ via the SVD) and in §6 (continuity of the RLS solution in the data), and Remark 3.1 is the template for the weighted least-squares interpretation of the structured and linear-fractional problems in §5.

Formalizing it. The theorem is proved in the paper; to our knowledge it has no machine-checked proof. The mission produces a formal account of second-order cone duality for a concrete program, the characterization of the optimal dual point by equality in the Cauchy–Schwarz inequality, and the minimum-norm characterization of A†bA^\dagger bA†b, all in terms of explicit Euclidean norms on Fin k → ℝ.

Difficulty

The paper's proof rests on strong duality for (15) ("both primal and dual problems are strictly feasible"), which it cites from the SOCP literature rather than proving; Mathlib has no second-order cone duality, so this step is the main gap. The degenerate case λ=τ\lambda = \tauλ=τ also needs care: there ∥Ax−b∥=0\|Ax - b\| = 0∥Ax−b∥=0, the residual term is not differentiable at the optimum, and the conclusion changes from a regularized inverse to a pseudoinverse. A statement that only handles the case Ax≠bAx \ne bAx=b, or that assumes the matrix A⊤A+μIA^\top A + \mu IA⊤A+μI invertible without deriving it from μ>0\mu > 0μ>0, misses part of the theorem.

Formalization scope

  • Normalization. The paper states Theorem 3.2 for ρ=1\rho = 1ρ=1 ("we take ρ=1\rho = 1ρ=1 in what follows", p. 1039) and obtains general ρ\rhoρ by the scaling φ(A,b,ρ)=ρ φ(A/ρ,b/ρ,1)\varphi(A, b, \rho) = \rho\,\varphi(A/\rho, b/\rho, 1)φ(A,b,ρ)=ρφ(A/ρ,b/ρ,1). Only the ρ=1\rho = 1ρ=1 statement is formalized.
  • The RLS solution. The perturbation model is not used here: all statements are about optimal points of (15). That the xxx-part of such a point is the RLS solution is Theorem 3.1 (mission I), and it is recalled in prose only.
  • Norms. Vectors are Fin k → ℝ; the Euclidean norm is the explicit eucNorm v = √(∑ vᵢ²) (Mathlib's ‖·‖ on Fin k → ℝ is the sup norm). Stacked vectors [x;1][x;1][x;1] and [u;v][u;v][u;v] are indexed by Fin m ⊕ Unit.
  • Optimality. "Optimal point" means feasible with objective no worse than every feasible point; the minimum and maximum are therefore attained by definition, and milestone 1 guarantees they exist.
  • Pseudoinverse. Mathlib has no matrix pseudoinverse, so A†bA^\dagger bA†b is stated as the minimum-norm solution of Ax=bAx = bAx=b, which is how the proof uses it. The branch "else" is ¬(μ>0)\neg(\mu > 0)¬(μ>0).
  • Inverse. (μI+A⊤A)−1(\mu I + A^\top A)^{-1}(μI+A⊤A)−1 is Mathlib's Matrix.inv; it is used only where μ>0\mu > 0μ>0, where the matrix is positive definite. τ≥1\tau \ge 1τ≥1 at every feasible point, so μ\muμ is well defined without an extra hypothesis.
  • No trivialization. The goal quantifies over optimal points of (15) over the whole feasible set, not over feasible points, and milestone 1 shows the hypothesis is satisfiable for every (A,b)(A, b)(A,b), including n=0n = 0n=0 or m=0m = 0m=0.
  • Weighted norm. For Remark 3.1, ∥r∥Θ\|r\|_\Theta∥r∥Θ​ for the diagonal Θ\ThetaΘ is written as ∑iri2/θi\sqrt{\sum_i r_i^2/\theta_i}∑i​ri2​/θi​​, which equals ∥Θ−1/2r∥\|\Theta^{-1/2}r\|∥Θ−1/2r∥ for positive weights.

Contributions welcome: second-order cone (or general conic) weak and strong duality for finite-dimensional programs, the equality case of Cauchy–Schwarz in the explicit-norm form used here, and a Moore–Penrose pseudoinverse for real matrices with its minimum-norm property. The platform's ConvexOptimization.conic_slater_strong_duality may help with the duality step.

Selected references

  • L. El Ghaoui and H. Lebret, Robust Solutions to Least-Squares Problems with Uncertain Data, SIAM J. Matrix Anal. Appl. 18(4):1035–1064, 1997. https://doi.org/10.1137/S0895479896298130
  • S. Chandrasekaran, G. H. Golub, M. Gu and A. H. Sayed, A new linear least-squares type model for parameter estimation in the presence of data uncertainties, cited as submitted to SIAM J. Matrix Anal. Appl. (reference [5] of the paper).
  • A. N. Tikhonov and V. Y. Arsenin, Solutions of Ill-Posed Problems, Wiley, New York, 1977 (reference [43] of the paper).
  • Y. Nesterov and A. Nemirovskii, Interior-Point Polynomial Algorithms in Convex Programming, SIAM, 1994. https://doi.org/10.1137/1.9781611970791
  • M. S. Lobo, L. Vandenberghe, S. Boyd and H. Lebret, Applications of Second-Order Cone Programming, Linear Algebra Appl. 284:193–228, 1998. https://doi.org/10.1016/S0024-3795(98)10032-0
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Calibrated Learning and Correlated Equilibrium I: Calibrated Forecasts with Best Responses Converge to the Set of Correlated EquilibriaResearch Paper

Motivation

A correlated equilibrium (Aumann 1974) is a joint distribution over the players' strategy profiles such that no player gains by deviating from the strategy the distribution recommends to them. It is the equilibrium notion that learning dynamics in repeated games most naturally reach, and a basic question in learning in games is which simple rules, played repeatedly, drive the empirical distribution of play to the set of correlated equilibria.

Foster and Vohra (1997) answer this with a hypothesis on forecasts instead of a particular algorithm. Each player forecasts the other's next move and best-responds to the forecast. They only require the forecasts to be calibrated in the sense of Dawid (1982): among the rounds in which a player forecast a given probability vector, the empirical frequencies of the opponent's moves must approach that vector. Their Theorem 1 says that this already forces the empirical joint distribution of play to approach the set of correlated equilibria. The paper uses this to argue that Bayesian players under a common prior, whose forecasts are calibrated by Dawid's theorem, end up playing a correlated equilibrium. That is an alternative to Aumann's (1987) derivation of correlated equilibrium from common priors and rationality.

Timeline:

  • Aumann (1974, 1987) introduces correlated equilibrium and derives it from Bayesian rationality.
  • Dawid (1982) proposes calibration as a minimal requirement on probability forecasts.
  • Foster and Vohra (1997) prove Theorem 1 (this mission) and show that calibrated forecasts exist once the forecaster may randomize.
  • Hart and Mas-Colell (2000) give regret matching, an adaptive procedure with the same limit set.

Setting

A finite two-player game GGG has strategy sets S(1)={0,…,m−1}S(1) = \{0, \dots, m-1\}S(1)={0,…,m−1} and S(2)={0,…,n−1}S(2) = \{0, \dots, n-1\}S(2)={0,…,n−1} and payoff matrices u1,u2:S(1)×S(2)→Ru_1, u_2 : S(1) \times S(2) \to \mathbb{R}u1​,u2​:S(1)×S(2)→R, which the players maximize. A joint distribution DDD is a nonnegative m×nm \times nm×n matrix with entries summing to 111. It is a correlated equilibrium if

∑x,yD(x,y) u1(Φ(x),y)≤∑x,yD(x,y) u1(x,y)for all Φ:S(1)→S(1),\sum_{x,y} D(x,y)\, u_1(\Phi(x), y) \le \sum_{x,y} D(x,y)\, u_1(x,y) \quad \text{for all } \Phi : S(1) \to S(1),x,y∑​D(x,y)u1​(Φ(x),y)≤x,y∑​D(x,y)u1​(x,y)for all Φ:S(1)→S(1),

and symmetrically for player 2. The set of correlated equilibria is π(G)\pi(G)π(G).

The game is played in rounds s=0,1,2,…s = 0, 1, 2, \dotss=0,1,2,…. In round sss player 1 issues a forecast f1(s)f_1(s)f1​(s), a probability vector over S(2)S(2)S(2), and player 2 issues a forecast f2(s)f_2(s)f2​(s) over S(1)S(1)S(1). Each player then plays a best response to its forecast, x(s)=R1(f1(s))x(s) = R_1(f_1(s))x(s)=R1​(f1​(s)) and y(s)=R2(f2(s))y(s) = R_2(f_2(s))y(s)=R2​(f2​(s)). Here R1R_1R1​ and R2R_2R2​ are best-reply functions: R1(p)R_1(p)R1​(p) maximizes ∑ypyu1(⋅,y)\sum_y p_y u_1(\cdot, y)∑y​py​u1​(⋅,y) for every probability vector ppp, and R1R_1R1​ is a fixed function of the forecast alone. This is the paper's standing assumption of a stationary, deterministic tie-breaking rule.

For a forecast sequence fff and the opponent's plays zzz, N(p,t)N(p,t)N(p,t) counts the rounds among the first ttt in which fff forecast ppp. ρ(p,j,t)\rho(p,j,t)ρ(p,j,t) is the fraction of those rounds in which the opponent played jjj, and 000 if there are none. The forecast is calibrated with respect to zzz if for every jjj

∑p∣ρ(p,j,t)−pj∣ N(p,t)t⟶0(t→∞).\sum_p |\rho(p,j,t) - p_j|\, \frac{N(p,t)}{t} \longrightarrow 0 \qquad (t \to \infty).p∑​∣ρ(p,j,t)−pj​∣tN(p,t)​⟶0(t→∞).

The empirical joint distribution Dt(x,y)D_t(x,y)Dt​(x,y) is the fraction of the first ttt rounds in which player 1 played xxx and player 2 played yyy.

Formalization targets

Goal: Theorem 1

If f1f_1f1​ is calibrated with respect to yyy and f2f_2f2​ is calibrated with respect to xxx, then

min⁡D∈π(G) max⁡x∈S(1), y∈S(2)∣Dt(x,y)−D(x,y)∣⟶0(t→∞).\min_{D \in \pi(G)} \ \max_{x \in S(1),\, y \in S(2)} |D_t(x,y) - D(x,y)| \longrightarrow 0 \qquad (t \to \infty).D∈π(G)min​ x∈S(1),y∈S(2)max​∣Dt​(x,y)−D(x,y)∣⟶0(t→∞).

The goal fixes no rate and no particular forecasting method: it asserts only convergence of DtD_tDt​ to the set π(G)\pi(G)π(G), for every calibrated forecast.

Milestones: the steps of the proof (pp. 44–45)

  1. DtD_tDt​ lies in the simplex for t≥1t \ge 1t≥1.
  2. For each x∈S(1)x \in S(1)x∈S(1), the set Mb(x)M_b(x)Mb​(x) of mixtures to which xxx is a best response is closed and convex.
  3. The mixtures Mp(x)M_p(x)Mp​(x) at which player 1 actually plays xxx satisfy Mp(x)⊆Mb(x)M_p(x) \subseteq M_b(x)Mp​(x)⊆Mb​(x).
  4. The identity writing Dt(x,y)D_t(x,y)Dt​(x,y) as a forecast-weighted term plus a calibration error.
  5. Calibration makes the error term vanish.
  6. The weighted average of the forecasts at which player 1 plays xxx lies in Mb(x)M_b(x)Mb​(x).
  7. For a convergent subsequence Dti→DD_{t_i} \to DDti​​→D, every row of DDD with positive mass, normalized, lies in Mb(x)M_b(x)Mb​(x).
  8. Every subsequential limit of DtD_tDt​ is a correlated equilibrium.

Further result: matching pennies (p. 46)

With the constant forecast (1/2,1/2)(1/2, 1/2)(1/2,1/2) and the non-stationary tie-break "heads on even rounds, tails on odd rounds", both forecasts are calibrated and every play is a best reply, yet DtD_tDt​ does not approach π(G)\pi(G)π(G). The stationarity assumption cannot be dropped.

Significance

The result. Theorem 1 separates what learning needs from how it is achieved. Any forecasting procedure that is calibrated, combined with myopic best responses, yields correlated equilibrium behaviour in the long run. The paper's Theorem 3 constructs a randomized calibrated forecaster, so the theorem gives an uncoupled learning procedure for correlated equilibrium, one that needs no knowledge of the opponent's payoffs. The converse direction, that every correlated equilibrium arises this way for almost every game, is the paper's Theorem 2 (a separate mission of this series).

Formalizing it. The theorem is proved in the paper and has no machine-checked proof on Prove2Me or, to the knowledge of this mission, elsewhere. The platform's existing correlated-equilibrium results (the Algorithmic Game Theory swap-regret development, AGT.swap_regret_correlated_equilibrium) reach correlated equilibrium through swap regret of mixed strategies, a different hypothesis and a different object. This mission adds a formal notion of calibration and the convergence argument, both reusable for the paper's Theorems 2 and 3 and for later work on calibration and learning.

Difficulty

The obvious reading of calibration is that each player's forecast converges to the opponent's empirical distribution; if that held, best responses to it would give convergence. It does not hold. Calibration constrains the opponent's frequencies only conditionally on the forecast issued, and the forecasts need not converge at all. What must be shown is a statement about the conditional distributions of the joint play given each strategy of player 1, while the set of forecasts issued keeps growing. Rows of the limit with zero mass carry no conditional distribution. The "min → 0" form also asks for more than a property of limit points: it is a uniform statement about all large ttt.

Formalization scope

  • Strategies are Fin m and Fin n; payoffs are real matrices; forecasts are real vectors required to be probability vectors in every round.
  • A correlated equilibrium is the joint-distribution form of p. 44 (the correlated strategy on a finite probability space is represented by its law). It is the ε=0\varepsilon = 0ε=0, two-player, payoff (not cost) instance of the published AGT.IsCorrelatedEquilibrium, restated rather than imported.
  • The stationary deterministic tie-break is modelled by arbitrary best-reply functions RiR_iRi​ of the forecast. They do not depend on the round, and the statements quantify over all of them, which includes the lowest-index rule.
  • Forecasts are sequences fi:N→Rkf_i : \mathbb{N} \to \mathbb{R}^kfi​:N→Rk. The theorem uses only the realized forecasts, and every sequence is realized by a rule reading the round number from the history.
  • Rounds are indexed from 000: "the first ttt rounds" are 0,…,t−10, \dots, t-10,…,t−1. D0=0D_0 = 0D0​=0 by Lean's division convention; only t≥1t \ge 1t≥1 and limits are used.
  • The calibration sum runs over the forecasts issued in the first ttt rounds, which is the paper's sum over all ppp with its zero terms removed. ρ(p,j,t)=0\rho(p,j,t) = 0ρ(p,j,t)=0 when N(p,t)=0N(p,t) = 0N(p,t)=0, as on the page.
  • "min … → 0" is stated as: for every ε>0\varepsilon > 0ε>0, eventually some D∈π(G)D \in \pi(G)D∈π(G) is within ε\varepsilonε of DtD_tDt​ in every coordinate. The two forms are equivalent because π(G)\pi(G)π(G) is compact and nonempty. The formalization avoids an infimum over π(G)\pi(G)π(G), which Lean would evaluate to 000 on an empty set.
  • A statement that drops the best-reply property, the probability-vector condition on forecasts, or the stationarity of RiR_iRi​ is not Theorem 1: the matching pennies example shows the last one is essential. Swapping the calibration hypotheses (player 1's forecast calibrated against player 1's own plays) type-checks when m=nm = nm=n and is not the theorem.
  • Only the two-player case is claimed. The paper says the results "generalize easily to the nnn-person case" without proof.

Proofs of any milestone, and reusable lemmas about calibration scores and compactness of the simplex of joint distributions, are welcome.

Selected references

  • D. P. Foster, R. V. Vohra, Calibrated learning and correlated equilibrium, Games and Economic Behavior 21 (1997) 40–55. https://doi.org/10.1006/game.1997.0595
  • R. J. Aumann, Subjectivity and correlation in randomized strategies, Journal of Mathematical Economics 1 (1974) 67–96. https://doi.org/10.1016/0304-4068(74)90037-8
  • R. J. Aumann, Correlated equilibrium as an expression of Bayesian rationality, Econometrica 55 (1987) 1–18. https://doi.org/10.2307/1911154
  • A. P. Dawid, The well-calibrated Bayesian, Journal of the American Statistical Association 77 (1982) 605–610. https://doi.org/10.1080/01621459.1982.10477856
  • S. Hart, A. Mas-Colell, A simple adaptive procedure leading to correlated equilibrium, Econometrica 68 (2000) 1127–1150. https://doi.org/10.1111/1468-0262.00153
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Robust Solutions to Least-Squares Problems with Uncertain Data III: Structured Robust Least Squares Is Solved Exactly by a Semidefinite ProgramResearch Paper

Motivation

Least squares fits a model Ax≈bAx \approx bAx≈b as if the data (A,b)(A, b)(A,b) were exact. In practice they are measured, rounded or estimated, and the least-squares solution can be very sensitive to such errors. El Ghaoui and Lebret (SIAM J. Matrix Anal. Appl. 18(4), 1997) proposed to treat the errors as deterministic, unknown but bounded, and to choose xxx minimizing the worst-case residual over all admissible data. For unstructured perturbations of [A b][A\ b][A b] bounded in Frobenius norm this leads to a second-order cone program (missions I and II of this series).

In many applications the perturbations have a known structure: a Toeplitz matrix stays Toeplitz, a parameter enters several entries at once, or only some entries are uncertain. An unstructured bound then over-estimates the worst case. The paper's §4 treats perturbations that are affine in a parameter vector δ\deltaδ bounded in Euclidean norm, and shows that the resulting structured robust least-squares (SRLS) problem is still solved exactly, now by a semidefinite program (SDP). This model of uncertainty (an ellipsoid of affinely parametrized data) is the one later adopted as the basic uncertainty set of robust optimization; see Ben-Tal and Nemirovski, Math. Oper. Res. 23(4), 1998.

Setting

Vectors carry the Euclidean norm ∥v∥=vTv\|v\| = \sqrt{v^Tv}∥v∥=vTv​. Given matrices A0,A1,…,Ap∈Rn×mA_0, A_1, \dots, A_p \in \mathbb{R}^{n\times m}A0​,A1​,…,Ap​∈Rn×m and vectors b0,b1,…,bp∈Rnb_0, b_1, \dots, b_p \in \mathbb{R}^nb0​,b1​,…,bp​∈Rn, define for every δ∈Rp\delta \in \mathbb{R}^pδ∈Rp

A(δ)=A0+∑i=1pδiAi,b(δ)=b0+∑i=1pδibi.\mathbf A(\delta) = A_0 + \sum_{i=1}^p \delta_i A_i, \qquad \mathbf b(\delta) = b_0 + \sum_{i=1}^p \delta_i b_i .A(δ)=A0​+i=1∑p​δi​Ai​,b(δ)=b0​+i=1∑p​δi​bi​.

For ρ≥0\rho \ge 0ρ≥0 and x∈Rmx \in \mathbb{R}^mx∈Rm the structured worst-case residual is

rS(A,b,ρ,x)=max⁡∥δ∥≤ρ∥A(δ)x−b(δ)∥,r_S(\mathbf A, \mathbf b, \rho, x) = \max_{\|\delta\| \le \rho} \|\mathbf A(\delta)x - \mathbf b(\delta)\|,rS​(A,b,ρ,x)=∥δ∥≤ρmax​∥A(δ)x−b(δ)∥,

and xxx is an SRLS solution if it minimizes rS(A,b,ρ,⋅)r_S(\mathbf A, \mathbf b, \rho, \cdot)rS​(A,b,ρ,⋅) over Rm\mathbb{R}^mRm. The paper takes ρ=1\rho = 1ρ=1 throughout §4 and writes rS(A,b,x)r_S(\mathbf A, \mathbf b, x)rS​(A,b,x).

For fixed xxx let M(x)=[A1x−b1 ⋯ Apx−bp]∈Rn×pM(x) = [A_1x - b_1\ \cdots\ A_px - b_p] \in \mathbb{R}^{n\times p}M(x)=[A1​x−b1​ ⋯ Ap​x−bp​]∈Rn×p and

F=M(x)TM(x),g=M(x)T(A0x−b0),h=∥A0x−b0∥2.F = M(x)^TM(x), \qquad g = M(x)^T(A_0x - b_0), \qquad h = \|A_0x - b_0\|^2 .F=M(x)TM(x),g=M(x)T(A0​x−b0​),h=∥A0​x−b0​∥2.

Since A(δ)x−b(δ)=(A0x−b0)+M(x)δ\mathbf A(\delta)x - \mathbf b(\delta) = (A_0x - b_0) + M(x)\deltaA(δ)x−b(δ)=(A0​x−b0​)+M(x)δ, the squared residual at δ\deltaδ is the quadratic function h+2gTδ+δTFδh + 2g^T\delta + \delta^TF\deltah+2gTδ+δTFδ. Finally, for scalars λ,τ\lambda, \tauλ,τ,

F(λ,τ)=[λ−τ−h−gT−gτI−F].\mathcal F(\lambda, \tau) = \begin{bmatrix} \lambda - \tau - h & -g^T \\ -g & \tau I - F \end{bmatrix}.F(λ,τ)=[λ−τ−h−g​−gTτI−F​].

Formalization targets

Goal: Theorem 4.2

With p≥1p \ge 1p≥1 and ρ=1\rho = 1ρ=1, consider the SDP in (λ,τ,x)(\lambda, \tau, x)(λ,τ,x)

minimize λsubject to[λ−τ0(A0x−b0)T0τIM(x)TA0x−b0M(x)I]⪰0.(32)\text{minimize } \lambda \quad \text{subject to} \quad \begin{bmatrix} \lambda - \tau & 0 & (A_0x - b_0)^T \\ 0 & \tau I & M(x)^T \\ A_0x - b_0 & M(x) & I \end{bmatrix} \succeq 0. \tag{32}minimize λsubject to​λ−τ0A0​x−b0​​0τIM(x)​(A0​x−b0​)TM(x)TI​​⪰0.(32)

The goal states that (a) for all xxx and λ\lambdaλ, some τ\tauτ makes (λ,τ,x)(\lambda, \tau, x)(λ,τ,x) feasible if and only if rS(A,b,x)2≤λr_S(\mathbf A, \mathbf b, x)^2 \le \lambdarS​(A,b,x)2≤λ; and (b) (λ,τ,x)(\lambda, \tau, x)(λ,τ,x) is optimal for (32) if and only if xxx is an SRLS solution, λ=rS(A,b,x)2\lambda = r_S(\mathbf A, \mathbf b, x)^2λ=rS​(A,b,x)2, and (λ,τ,x)(\lambda, \tau, x)(λ,τ,x) is feasible. This is the precise content of the paper's "the SRLS can be solved by computing an optimal solution of (32)".

Milestones

  1. Lemma 2.1 (S-procedure), in two items: the multiplier condition is sufficient for every ppp; for p=1p = 1p=1 it is also necessary when F1(ζ0)>0F_1(\zeta_0) > 0F1​(ζ0​)>0 for some ζ0\zeta_0ζ0​.
  2. Eq. (28): rS(A,b,x)2=max⁡δTδ≤1[1;δ]T[hgTgF][1;δ]r_S(\mathbf A, \mathbf b, x)^2 = \max_{\delta^T\delta \le 1} [1;\delta]^T \begin{bmatrix} h & g^T \\ g & F\end{bmatrix} [1;\delta]rS​(A,b,x)2=maxδTδ≤1​[1;δ]T[hg​gTF​][1;δ].
  3. Eq. (29): for λ≥0\lambda \ge 0λ≥0, that quadratic form is ≤λ\le \lambda≤λ on the unit ball if and only if F(λ,τ)⪰0\mathcal F(\lambda, \tau) \succeq 0F(λ,τ)⪰0 for some τ\tauτ.
  4. Theorem 4.1, first assertion: rS(A,b,x)2=min⁡{λ:∃τ, F(λ,τ)⪰0}r_S(\mathbf A, \mathbf b, x)^2 = \min\{\lambda : \exists \tau,\ \mathcal F(\lambda, \tau) \succeq 0\}rS​(A,b,x)2=min{λ:∃τ, F(λ,τ)⪰0}, the minimum attained.
  5. §4.2, Schur-complement step: the matrix of (32) is positive semidefinite if and only if F(λ,τ)\mathcal F(\lambda, \tau)F(λ,τ) is.

Significance

The result shows that a min–max problem over a nonconvex worst case (the inner problem maximizes a convex quadratic over a ball) is equivalent to a single convex SDP whose size is linear in nnn, mmm and ppp, and hence solvable in polynomial time by interior-point methods. It covers as special cases the unstructured problem of §3, least squares with uncertainty in selected entries, and Toeplitz or otherwise patterned perturbations. The exactness contrasts with the next section of the paper, where the linear-fractional and ℓ∞\ell_\inftyℓ∞​-bounded versions are in general only bounded from above, or shown NP-hard.

The result is proved in the paper; to the best of current knowledge it has not been formalized. The platform already has the one-constraint S-procedure (ConvexOptimization.s_procedure, proved, in a different sign and block convention); this mission adds the robust least-squares objects, the reduction to the S-procedure, the Schur-complement step, and the optimal-solution correspondence of Theorem 4.2. The worst-case residual and SDP (32) definitions are reusable by later robust-regression missions.

Difficulty

The obvious approach is to compute the inner maximum directly. The function δ↦h+2gTδ+δTFδ\delta \mapsto h + 2g^T\delta + \delta^TF\deltaδ↦h+2gTδ+δTFδ is convex, so its maximum over the unit ball is attained on the boundary, but it is not given by any closed-form expression in general, and maximizing a convex function is not a convex problem. Exactness therefore rests on the lossless S-procedure for one quadratic constraint, a nonconvex duality statement that fails for two or more constraints; the sufficient direction alone only yields an upper bound.

A second point is passing from "for fixed xxx" (Theorem 4.1) to "optimal over xxx" (Theorem 4.2): F(λ,τ)\mathcal F(\lambda, \tau)F(λ,τ) is quadratic in xxx, and only the Schur-complement lift (32) is jointly affine in (λ,τ,x)(\lambda, \tau, x)(λ,τ,x). The correspondence of optimal solutions must then be checked in both directions, including that the optimal λ\lambdaλ is the squared residual and not the residual.

Formalization scope

  • Data are A0 : Matrix (Fin n) (Fin m) ℝ, A : Fin p → Matrix (Fin n) (Fin m) ℝ, b0 : Fin n → ℝ, b : Fin p → Fin n → ℝ; A i is the paper's Ai+1A_{i+1}Ai+1​ (0-based index). Vectors live in Fin k → ℝ with the Euclidean norm written out as ∑ivi2\sqrt{\sum_i v_i^2}∑i​vi2​​, never Mathlib's sup norm.
  • The maximum defining rSr_SrS​ is sSup of the set of attained residuals over the closed ball; for ρ≥0\rho \ge 0ρ≥0 this set is nonempty and bounded, so sSup is the true maximum. The theorems use ρ=1\rho = 1ρ=1, as the paper does; the paper derives general ρ\rhoρ by scaling and that is not stated here.
  • Block matrices are Matrix.fromBlocks in the printed order (scalar block first: Unit ⊕ Fin p; for (32), (Unit ⊕ Fin p) ⊕ Fin n). "⪰0\succeq 0⪰0" is Mathlib's PosSemidef, which includes symmetry; all matrices here are symmetric by construction.
  • p≥1p \ge 1p≥1 is assumed in (29), Theorem 4.1 and Theorem 4.2, although the paper does not state it: for p=0p = 0p=0 the block τI\tau IτI is empty, τ\tauτ is unconstrained, every λ\lambdaλ is feasible and both SDPs lose their meaning. Eq. (28), Lemma 2.1 and the Schur-complement step hold for every ppp and are stated without it.
  • Optimality in (32) is stated as feasibility plus λ≤λ′\lambda \le \lambda'λ≤λ′ for every feasible (λ′,τ′,x′)(\lambda', \tau', x')(λ′,τ′,x′). A formalization that only proves existence of some feasible τ\tauτ, or only an inequality between the optimal values, is weaker than Theorem 4.2 and does not close the goal.
  • Theorem 4.1's second and third assertions (the one-dimensional reformulation (30)–(31) and the worst-case perturbation) are not included: they use the notion "(F,g)(F, g)(F,g)-controllable", which the paper does not define.
  • Useful infrastructure: Mathlib's Schur-complement lemmas (Matrix.PosSemidef.fromBlocks₂₂ and relatives in LinearAlgebra.Matrix.SchurComplement); the platform's ConvexOptimization.s_procedure and ConvexOptimization.single_constraint_quadratic_strong_duality with their definitions ConvexOptimization_quadraticForms, included as reference items. A bridge lemma between the platform's block convention and this mission's is a welcome contribution, as is a general-ρ\rhoρ version.

Selected references

  • L. El Ghaoui and H. Lebret, Robust Solutions to Least-Squares Problems with Uncertain Data, SIAM J. Matrix Anal. Appl. 18(4):1035–1064, 1997. https://doi.org/10.1137/S0895479896298130
  • S. Boyd, L. El Ghaoui, E. Feron and V. Balakrishnan, Linear Matrix Inequalities in System and Control Theory, SIAM, 1994 (the S-procedure, p. 24). https://doi.org/10.1137/1.9781611970777
  • A. Ben-Tal and A. Nemirovski, Robust Convex Optimization, Math. Oper. Res. 23(4):769–805, 1998. https://doi.org/10.1287/moor.23.4.769
  • I. Pólik and T. Terlaky, A Survey of the S-Lemma, SIAM Review 49(3):371–418, 2007. https://doi.org/10.1137/S003614450444614X
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