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The OR Formalization Drive

Help us formalize the operations research literature in Lean.

1094 missions

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Algorithmic Game TheoryControl TheoryOperations Research+1·Captain: mikedeng1

Nonzero-Sum Stochastic Differential Games with Impulse Controls: A Verification Theorem with Applications 1: Regular Solutions of the Quasi-Variational Inequalities Give Nash Equilibrium PayoffsResearch Paper

Motivation

Many economic and engineering systems are steered by agents who act at discrete instants rather than continuously: a central bank intervenes on an exchange rate, two energy producers adjust a shared stock, a firm rebalances inventory. Each action has a fixed cost, so continuous control is not realistic. The mathematical model is impulse control: the state follows a diffusion, and a controller may shift it at chosen stopping times by paying a cost. The single-controller theory is classical (Øksendal and Sulem, Applied Stochastic Control of Jump Diffusions, 2007). When two controllers with different objectives act on the same state, the result is a nonzero-sum stochastic differential game with impulse controls.

Before Aïd, Basei, Callegaro, Campi and Vargiolu, the literature on games with impulse controls was almost entirely zero-sum: Cosso (SIAM J. Control Optim., 2013) characterised the value of zero-sum impulse games through a double-obstacle quasi-variational inequality in the viscosity sense. Their paper (Math. Oper. Res. 45(1), 2020; arXiv:1605.00039) gives the first general formulation of the nonzero-sum case together with a verification theorem: a system of quasi-variational inequalities (QVIs) whose sufficiently regular solutions are the equilibrium payoffs. Its Section 4 then computes Nash equilibria in closed form for a one-dimensional game.

Setting

A kkk-dimensional Brownian motion WWW on a filtered probability space satisfying the usual conditions drives the state equation

dYs=b(Ys) ds+σ(Ys) dWs,Ys∈Rd,dY_s=b(Y_s)\,ds+\sigma(Y_s)\,dW_s ,\qquad Y_s\in\mathbb R^d,dYs​=b(Ys​)ds+σ(Ys​)dWs​,Ys​∈Rd,

with globally Lipschitz bbb and σ\sigmaσ. The game takes place in an open set S⊆RdS\subseteq\mathbb R^dS⊆Rd and ends at the exit time τS\tau_SτS​ of the state from SSS. Each of two players i∈{1,2}i\in\{1,2\}i∈{1,2} has a nonempty impulse set Zi⊆RliZ_i\subseteq\mathbb R^{l_i}Zi​⊆Rli​ and a continuous impulse map Γi:S×Zi→S\Gamma^i:S\times Z_i\to SΓi:S×Zi​→S: an intervention with impulse δ\deltaδ moves the state from yyy to Γi(y,δ)\Gamma^i(y,\delta)Γi(y,δ).

A strategy of player iii is a pair φi=(Ci,ξi)\varphi_i=(\mathcal C_i,\xi_i)φi​=(Ci​,ξi​) with Ci⊆S\mathcal C_i\subseteq SCi​⊆S open and ξi:S→Zi\xi_i:S\to Z_iξi​:S→Zi​ continuous. Player iii intervenes as soon as the state leaves Ci\mathcal C_iCi​, with impulse ξi(y)\xi_i(y)ξi​(y) at the current state yyy. Player 1 has priority on ties, and several interventions may happen at the same instant. This defines the controlled process XXX, the intervention times τi,n\tau_{i,n}τi,n​ and impulses δi,n\delta_{i,n}δi,n​ of each player, and the states X(τi,n)−X_{(\tau_{i,n})^-}X(τi,n​)−​ just before each intervention. The payoff of player iii is

Ji(x;φ1,φ2)=E[∫0τSe−ρisfi(Xs)ds+∑τi,n<τSe−ρiτi,nϕi(X(τi,n)−,δi,n)+∑τj,n<τSe−ρiτj,nψi(X(τj,n)−,δj,n)+e−ρiτShi(XτS)1{τS<∞}],J^i(x;\varphi_1,\varphi_2)=\mathbb E\Big[\int_0^{\tau_S}e^{-\rho_is}f_i(X_s)ds+\sum_{\tau_{i,n}<\tau_S}e^{-\rho_i\tau_{i,n}}\phi_i(X_{(\tau_{i,n})^-},\delta_{i,n})+\sum_{\tau_{j,n}<\tau_S}e^{-\rho_i\tau_{j,n}}\psi_i(X_{(\tau_{j,n})^-},\delta_{j,n})+e^{-\rho_i\tau_S}h_i(X_{\tau_S})\mathbf 1_{\{\tau_S<\infty\}}\Big],Ji(x;φ1​,φ2​)=E[∫0τS​​e−ρi​sfi​(Xs​)ds+τi,n​<τS​∑​e−ρi​τi,n​ϕi​(X(τi,n​)−​,δi,n​)+τj,n​<τS​∑​e−ρi​τj,n​ψi​(X(τj,n​)−​,δj,n​)+e−ρi​τS​hi​(XτS​​)1{τS​<∞}​],

where j≠ij\ne ij=i, ρi>0\rho_i>0ρi​>0, fif_ifi​ is a running payoff, ϕi\phi_iϕi​ the cost of one's own interventions, ψi\psi_iψi​ the gain from the opponent's, and hih_ihi​ a terminal payoff on ∂S\partial S∂S. A pair of strategies is xxx-admissible, (φ1,φ2)∈Φx(\varphi_1,\varphi_2)\in\Phi_x(φ1​,φ2​)∈Φx​, when these four terms are integrable, sup⁡s≤τS∣Xs∣\sup_{s\le\tau_S}|X_s|sups≤τS​​∣Xs​∣ has all moments, and the interventions do not accumulate before τS\tau_SτS​. A Nash equilibrium is a pair in Φx\Phi_xΦx​ from which no player gains by a unilateral admissible deviation.

Given candidate payoff functions V1,V2V_1,V_2V1​,V2​ on Sˉ\bar SSˉ, let δi(x)\delta_i(x)δi​(x) be the unique maximiser of Vi(Γi(x,δ))+ϕi(x,δ)V_i(\Gamma^i(x,\delta))+\phi_i(x,\delta)Vi​(Γi(x,δ))+ϕi​(x,δ) over ZiZ_iZi​. Define MiVi(x)=Vi(Γi(x,δi(x)))+ϕi(x,δi(x))\mathcal M_iV_i(x)=V_i(\Gamma^i(x,\delta_i(x)))+\phi_i(x,\delta_i(x))Mi​Vi​(x)=Vi​(Γi(x,δi​(x)))+ϕi​(x,δi​(x)), HiVi(x)=Vi(Γj(x,δj(x)))+ψi(x,δj(x))\mathcal H_iV_i(x)=V_i(\Gamma^j(x,\delta_j(x)))+\psi_i(x,\delta_j(x))Hi​Vi​(x)=Vi​(Γj(x,δj​(x)))+ψi​(x,δj​(x)), the continuation region Di={MiVi−Vi<0}\mathcal D_i=\{\mathcal M_iV_i-V_i<0\}Di​={Mi​Vi​−Vi​<0} and the generator AV=b⋅∇V+12tr⁡(σσtD2V)\mathcal AV=b\cdot\nabla V+\tfrac12\operatorname{tr}(\sigma\sigma^tD^2V)AV=b⋅∇V+21​tr(σσtD2V). The QVI system is

Vi=hi on ∂S,MjVj−Vj≤0 on S,HiVi−Vi=0 on {MjVj=Vj},max⁡{AVi−ρiVi+fi, MiVi−Vi}=0 on Dj.V_i=h_i\ \text{on }\partial S,\quad \mathcal M_jV_j-V_j\le0\ \text{on }S,\quad \mathcal H_iV_i-V_i=0\ \text{on }\{\mathcal M_jV_j=V_j\},\quad \max\{\mathcal AV_i-\rho_iV_i+f_i,\ \mathcal M_iV_i-V_i\}=0\ \text{on }\mathcal D_j .Vi​=hi​ on ∂S,Mj​Vj​−Vj​≤0 on S,Hi​Vi​−Vi​=0 on {Mj​Vj​=Vj​},max{AVi​−ρi​Vi​+fi​, Mi​Vi​−Vi​}=0 on Dj​.

Formalization targets

Goal: Theorem 3.3 (verification theorem)

Suppose V1,V2V_1,V_2V1​,V2​ solve the QVI system, Vi∈C2(Dj∖∂Di)∩C1(Dj)∩C(Sˉ)V_i\in C^2(\mathcal D_j\setminus\partial\mathcal D_i)\cap C^1(\mathcal D_j)\cap C(\bar S)Vi​∈C2(Dj​∖∂Di​)∩C1(Dj​)∩C(Sˉ) with polynomial growth, ∂Di\partial\mathcal D_i∂Di​ is a Lipschitz surface near which ViV_iVi​ has locally bounded first and second derivatives, x∈Sx\in Sx∈S, and the threshold pair φi∗=(Di,δi)\varphi_i^*=(\mathcal D_i,\delta_i)φi∗​=(Di​,δi​) is xxx-admissible. Then

(φ1∗,φ2∗) is a Nash equilibrium andVi(x)=Ji(x;φ1∗,φ2∗),i=1,2.(\varphi_1^*,\varphi_2^*)\ \text{is a Nash equilibrium and}\quad V_i(x)=J^i(x;\varphi_1^*,\varphi_2^*),\qquad i=1,2 .(φ1∗​,φ2∗​) is a Nash equilibrium andVi​(x)=Ji(x;φ1∗​,φ2∗​),i=1,2.

Milestones

  • Lemma 2.3: the controlled process is the concatenation of diffusion pieces, it jumps only at interventions, and between interventions it stays in C1∩C2\mathcal C_1\cap\mathcal C_2C1​∩C2​.
  • Remark 3.6, (3.8b), (3.8d), (3.8f): against φ2∗\varphi_2^*φ2∗​, the state stays in D2\mathcal D_2D2​, and player 2 intervenes only on {M2V2=V2}\{\mathcal M_2V_2=V_2\}{M2​V2​=V2​} with impulse δ2\delta_2δ2​.
  • Step 1 of the proof: V1(x)≥J1(x;φ1,φ2∗)V_1(x)\ge J^1(x;\varphi_1,\varphi_2^*)V1​(x)≥J1(x;φ1​,φ2∗​) for every admissible deviation φ1\varphi_1φ1​.
  • Step 2 of the proof: V1(x)=J1(x;φ1∗,φ2∗)V_1(x)=J^1(x;\varphi_1^*,\varphi_2^*)V1​(x)=J1(x;φ1∗​,φ2∗​).

The goal follows from Steps 1 and 2 and their mirror images for player 2.

Significance

The theorem turns the search for Nash equilibria of nonzero-sum impulse games, an infinite-dimensional fixed-point problem over strategy pairs, into a deterministic problem: find functions satisfying a system of coupled QVIs with prescribed regularity. The regularity conditions become smooth-pasting conditions, hence a system of algebraic equations; Section 4 of the paper solves it explicitly for a one-dimensional game with linear payoffs. A further consequence is structural: equilibrium payoffs need only be C2C^2C2 on the opponent's continuation region, which is what lets non-smooth, piecewise-defined candidates qualify.

The result is proved in the paper; no machine-checked version exists. A complete formalization would be the first verified verification theorem for impulse control, single-player or game, and would expose every convention of the model: priority on ties, simultaneous interventions, the treatment of exit, and the integrability of the payoff. Several of these conventions need correction on the page, as listed below.

Difficulty

The heuristic argument applies Itô's formula to e−ρ1tV1(Xt)e^{-\rho_1t}V_1(X_t)e−ρ1​tV1​(Xt​) and uses the QVIs term by term. This fails on two counts. First, V1V_1V1​ is only C1C^1C1 across the free boundary ∂D1\partial\mathcal D_1∂D1​, so Itô's formula does not apply directly. The paper mollifies V1V_1V1​ (following Øksendal's proof of his verification theorem for optimal stopping) and must control the second derivatives near a Lipschitz boundary. Second, the sums over interventions may be infinite and the horizon unbounded, so expectations and limits do not commute. The passage to the limit needs the integrability built into Φx\Phi_xΦx​ and the polynomial growth of ViV_iVi​. The stochastic-calculus infrastructure itself (Itô's formula for continuous semimartingales stopped at random times, strong solutions of Lipschitz SDEs restarted at stopping times) is largely missing from Mathlib.

Formalization scope

The Lean model is pathwise. A realization is a sequence of diffusion pieces, each solving the state equation from the random restart time with the restart value. The Itô integral is the published relation EthierKurtz.HasBrownianItoIntegral, and the stochastic basis uses the published You2015.Shared.UsualConditions and IsFBrownian. Times take values in [0,∞][0,\infty][0,∞] with e−ρ⋅∞=0e^{-\rho\cdot\infty}=0e−ρ⋅∞=0, and the state space is EuclideanSpace ℝ (Fin d). Φx\Phi_xΦx​ asks for one admissible realization, while the Nash inequalities and the payoff identity hold on every admissible realization; strong uniqueness makes these readings equivalent.

The following deviate from the page and are disclosed in the items:

  1. δi\delta_iδi​ is assumed continuous, so that φi∗\varphi_i^*φi∗​ is a strategy.
  2. The fourth QVI is imposed on Dj∖∂Di\mathcal D_j\setminus\partial\mathcal D_iDj​∖∂Di​, where AVi\mathcal AV_iAVi​ exists.
  3. The exit time is αkˉ+1S\alpha^S_{\bar k+1}αkˉ+1S​, not the printed αkˉS\alpha^S_{\bar k}αkˉS​.
  4. The gain term of (2.7) is read with the opponent's interventions.
  5. The supremum in (2.8) is taken over [0,τS][0,\tau_S][0,τS​].
  6. Interventions accumulating at a finite τS\tau_SτS​ are excluded from Φx\Phi_xΦx​, since the page leaves XτSX_{\tau_S}XτS​​ undefined there.
  7. Lemma 2.3 is stated in corrected form for simultaneous and boundary interventions.

The payoff is a Bochner expectation only inside Φx\Phi_xΦx​, which requires the L1L^1L1 conditions of (2.7) and the integrability of each payoff. A non-integrable deviation therefore never receives the junk payoff 000, and the Nash inequality cannot hold vacuously.

Contributions are welcome on the stochastic-calculus layer this needs (Itô's formula, strong existence and uniqueness for Lipschitz SDEs, optional stopping for stochastic integrals) and on the mollification lemma for functions that are C1C^1C1 with piecewise bounded second derivatives across a Lipschitz surface. These are reusable well beyond this mission.

Selected references

  • R. Aïd, M. Basei, G. Callegaro, L. Campi, T. Vargiolu, Nonzero-sum stochastic differential games with impulse controls: a verification theorem with applications, Math. Oper. Res. 45(1), 2020 (accepted manuscript, arXiv:1605.00039v4). https://arxiv.org/abs/1605.00039
  • A. Cosso, Stochastic differential games involving impulse controls and double-obstacle quasi-variational inequalities, SIAM J. Control Optim. 51(3), 2102–2131, 2013.
  • B. Øksendal, Stochastic Differential Equations, 6th ed., Springer, 2003. https://doi.org/10.1007/978-3-642-14394-6
  • B. Øksendal, A. Sulem, Applied Stochastic Control of Jump Diffusions, 2nd ed., Springer, 2007. https://doi.org/10.1007/978-3-540-69826-5
9 thms1 active userReviewed
Bandit AlgorithmsMachine LearningOperations Research+1·Captain: mikedeng1

Analysis of Thompson Sampling for the Multi-armed Bandit Problem 1: Logarithmic Regret for Two ArmsResearch Paper

Motivation

Thompson Sampling (TS) is the oldest heuristic for the stochastic multi-armed bandit problem: it was proposed by Thompson in 1933 (Biometrika 25) and is used in practice for online advertising and recommendation, where it often performs as well as or better than upper-confidence-bound methods (Chapelle and Li, NIPS 2011; Scott 2010). Until 2012 its theoretical guarantees for the frequentist regret were weak: earlier analyses gave only o(T)o(T)o(T) regret in time TTT (Granmo 2010; May, Korda, Lee and Leslie 2011).

Agrawal and Goyal, Analysis of Thompson Sampling for the Multi-armed Bandit Problem (arXiv:1111.1797v3, COLT 2012), gave the first logarithmic finite-time bound on the expected regret of TS. This mission formalizes their two-armed result, Theorem 1. A companion mission covers the NNN-armed bound, Theorem 2.

Timeline. Lai and Robbins (1985) proved that every consistent algorithm has regret at least [∑iΔi/D(μi∥μ∗)+o(1)]ln⁡T\big[\sum_i \Delta_i/D(\mu_i\|\mu^*)+o(1)\big]\ln T[∑i​Δi​/D(μi​∥μ∗)+o(1)]lnT. Auer, Cesa-Bianchi and Fischer (2002) gave UCB1 with an O(∑iln⁡T/Δi)O(\sum_i \ln T/\Delta_i)O(∑i​lnT/Δi​) finite-time bound. Agrawal and Goyal (2012) proved O(ln⁡T/Δ+1/Δ3)O(\ln T/\Delta+1/\Delta^3)O(lnT/Δ+1/Δ3) for two-armed TS. Kaufmann, Korda and Munos (ALT 2012) and Agrawal and Goyal (AISTATS 2013) later proved asymptotically optimal bounds for Bernoulli TS.

Setting

There are two arms. Arm i∈{1,2}i\in\{1,2\}i∈{1,2} has a fixed, unknown reward distribution DiD_iDi​ supported in [0,1][0,1][0,1], with mean μi\mu_iμi​. Plays of an arm give i.i.d. rewards, independent of the other arm. Arm 1 is the unique optimal arm, μ1>μ2\mu_1>\mu_2μ1​>μ2​, and Δ=μ1−μ2\Delta=\mu_1-\mu_2Δ=μ1​−μ2​ is the gap.

Thompson Sampling for general stochastic bandits (Algorithm 2 of the paper) keeps, for each arm iii, a success count SiS_iSi​ and a failure count FiF_iFi​, both starting at 000. In each round t=1,2,…t=1,2,\dotst=1,2,… it

  1. samples, independently for each arm, θi(t)∼Beta(Si+1,Fi+1)\theta_i(t)\sim\mathrm{Beta}(S_i+1,F_i+1)θi​(t)∼Beta(Si​+1,Fi​+1);
  2. plays i(t)=arg⁡max⁡iθi(t)i(t)=\arg\max_i\theta_i(t)i(t)=argmaxi​θi​(t) and observes a reward r~t∼Di(t)\tilde r_t\sim D_{i(t)}r~t​∼Di(t)​;
  3. performs a Bernoulli trial with success probability r~t\tilde r_tr~t​, with outcome rt∈{0,1}r_t\in\{0,1\}rt​∈{0,1};
  4. increments Si(t)S_{i(t)}Si(t)​ if rt=1r_t=1rt​=1 and Fi(t)F_{i(t)}Fi(t)​ otherwise.

ki(t)k_i(t)ki​(t) is the number of plays of arm iii before round ttt. The expected regret in time TTT is

E[R(T)]=E[∑t=1T(μ1−μi(t))],\mathbb E[\mathcal R(T)]=\mathbb E\Big[\sum_{t=1}^T(\mu_1-\mu_{i(t)})\Big],E[R(T)]=E[t=1∑T​(μ1​−μi(t)​)],

the expectation being over the rewards and the algorithm's randomness.

The analysis uses the Beta cdf Fα,βbetaF^{beta}_{\alpha,\beta}Fα,βbeta​, the binomial cdf Fn,pBF^B_{n,p}Fn,pB​, and the random variable X(j,s,y)X(j,s,y)X(j,s,y): the number of independent Beta(s+1,j−s+1)\mathrm{Beta}(s+1,j-s+1)Beta(s+1,j−s+1) draws made before one exceeds yyy.

Formalization targets

Goal: Theorem 1 (p. 3)

There is an absolute constant C>0C>0C>0 such that for every two-armed instance with rewards in [0,1][0,1][0,1] and μ1>μ2\mu_1>\mu_2μ1​>μ2​, and every T≥2T\ge 2T≥2,

E[R(T)]≤C(ln⁡TΔ+1Δ3).\mathbb E[\mathcal R(T)]\le C\Big(\frac{\ln T}{\Delta}+\frac1{\Delta^3}\Big).E[R(T)]≤C(ΔlnT​+Δ31​).

The constant is not fixed numerically: the paper states the theorem in O(⋅)O(\cdot)O(⋅) form (footnote 1), and the explicit display it reports on p. 8, 40ln⁡T/Δ+48/Δ3+18Δ40\ln T/\Delta+48/\Delta^3+18\Delta40lnT/Δ+48/Δ3+18Δ, is not the formal claim.

Milestones

  • Fact 1 (p. 12): Fα,βbeta(y)=1−Fα+β−1,yB(α−1)F^{beta}_{\alpha,\beta}(y)=1-F^B_{\alpha+\beta-1,y}(\alpha-1)Fα,βbeta​(y)=1−Fα+β−1,yB​(α−1) for positive integers α,β\alpha,\betaα,β.
  • Lemma 1 (p. 6): E[X(j,s,y)]=1/Fj+1,yB(s)−1\mathbb E[X(j,s,y)]=1/F^B_{j+1,y}(s)-1E[X(j,s,y)]=1/Fj+1,yB​(s)−1.
  • Lemma 6 (p. 13): Hoeffding-type bounds (10)–(11) on binomial cdfs.
  • Fact 2 (p. 13): every median of Binomial(n,p)\mathrm{Binomial}(n,p)Binomial(n,p) is ⌊np⌋\lfloor np\rfloor⌊np⌋ or ⌈np⌉\lceil np\rceil⌈np⌉.
  • Lemma 2 (p. 7): Pr⁡(E2(t))≥1−2/T2\Pr(E_2(t))\ge 1-2/T^2Pr(E2​(t))≥1−2/T2, where E2(t)={θ2(t)≤μ2+Δ/2 or k2(t)<24ln⁡T/Δ2}E_2(t)=\{\theta_2(t)\le\mu_2+\Delta/2\ \text{or}\ k_2(t)<24\ln T/\Delta^2\}E2​(t)={θ2​(t)≤μ2​+Δ/2 or k2​(t)<24lnT/Δ2}.
  • Lemma 3 (p. 7): a three-case bound on E[E[min⁡{X(j,s(j),y),T}∣s(j)]]\mathbb E\big[\mathbb E[\min\{X(j,s(j),y),T\}\mid s(j)]\big]E[E[min{X(j,s(j),y),T}∣s(j)]] for s(j)∼Binomial(j,μ1)s(j)\sim\mathrm{Binomial}(j,\mu_1)s(j)∼Binomial(j,μ1​).
  • Eq. (1) (p. 7): E[k2(T)]≤C(ln⁡T/Δ2+1/Δ4)\mathbb E[k_2(T)]\le C(\ln T/\Delta^2+1/\Delta^4)E[k2​(T)]≤C(lnT/Δ2+1/Δ4).

Significance

The result. Theorem 1 shows that TS, a randomized Bayesian heuristic with no explicit confidence bonus, has regret logarithmic in TTT on every two-armed instance, matching the order in TTT of the Lai–Robbins lower bound. The proof introduced a way to control the optimal arm's waiting time between plays through the Beta–Binomial duality, and later analyses of TS reuse that device.

Formalizing it. The result is proved on paper and has no machine-checked proof that we know of. The platform's existing TS results concern Gaussian TS (Lattimore and Szepesvári, Ch. 36) and Bayesian regret, which are different algorithms or regret notions. A formalization adds a reusable Lean model of Algorithm 2 on [0,1][0,1][0,1]-valued rewards, Beta–Binomial facts (Fact 1, Lemma 1), a binomial-median theorem, and binomial Hoeffding bounds. It also produces a proof with a constant that has been checked, since the printed constants contain an arithmetic slip.

Difficulty

The standard UCB argument does not transfer to TS. For UCB, the optimal arm's index exceeds its mean with high probability however often the arm has been played, because the exploration bonus is deterministic; the analysis then only has to count plays of the suboptimal arm until its own index concentrates, after Θ(ln⁡T/Δ2)\Theta(\ln T/\Delta^2)Θ(lnT/Δ2) plays. Under TS the optimal arm's sample θ1(t)\theta_1(t)θ1​(t) is random and, if the arm has been played rarely or its early rewards were poor, it falls below μ2\mu_2μ2​ with constant probability. The optimal arm may then wait a long, random time between plays, and the length of that wait depends on the arm's posterior, which in turn depends on how long it has waited. Counting plays of the suboptimal arm with a union bound over rounds, under the assumption that the optimal arm is already concentrated, therefore does not work; controlling these waiting times is the central difficulty and is where the 1/Δ31/\Delta^31/Δ3 dependence enters.

Formalization scope

  • Model. The instance is the platform's StochasticBandit 2 (a probability measure on R\mathbb RR per arm, mean banditArmMean), with the hypothesis that each reward law gives mass 111 to [0,1][0,1][0,1]. Lean arm 0 is the paper's arm 1 and Lean arm 1 the paper's arm 2. Lean rounds are indexed from 000.
  • Algorithm. Algorithm 2 is realized on one probability space with three independent i.i.d. tables: Beta draws W(i,t,a,b)∼Beta(a+1,b+1)W(i,t,a,b)\sim\mathrm{Beta}(a+1,b+1)W(i,t,a,b)∼Beta(a+1,b+1), rewards X(i,t)∼DiX(i,t)\sim D_iX(i,t)∼Di​, and uniforms V(i,t)V(i,t)V(i,t). Round ttt uses θi(t)=W(i,t,Si(t),Fi(t))\theta_i(t)=W(i,t,S_i(t),F_i(t))θi​(t)=W(i,t,Si​(t),Fi​(t)), r~t=X(i(t),t)\tilde r_t=X(i(t),t)r~t​=X(i(t),t) and rt=1{V(i(t),t)<r~t}r_t=\mathbf 1\{V(i(t),t)<\tilde r_t\}rt​=1{V(i(t),t)<r~t​}. Ties in the arg max go to the smaller index (a null event).
  • Values. Regret and expectations are lower Lebesgue integrals in [0,∞][0,\infty][0,∞]. X(j,s,y)X(j,s,y)X(j,s,y) is N∪{∞}\mathbb N\cup\{\infty\}N∪{∞}-valued, so Lemma 1 at y=1y=1y=1 reads ∞=∞\infty=\infty∞=∞, as in the paper.
  • O(·). The paper's O(⋅)O(\cdot)O(⋅) (footnote 1: f≤cgf\le cgf≤cg for n≥n0n\ge n_0n≥n0​) is stated with one universal constant C>0C>0C>0, quantified before the instance, the means and the horizon, for all T≥2T\ge 2T≥2. Eq. (1) is stated the same way, without its printed numerals.
  • Not trivial. The goal is about Algorithm 2 itself, with fresh Beta samples, fresh rewards and the Bernoulli coin. A statement about "any policy satisfying Lemma 2's event bound", or one whose constant depends on Δ\DeltaΔ, the reward laws or TTT, would not be Theorem 1.
  • Edge cases. μ1<1\mu_1<1μ1​<1 is assumed only in Lemma 3, where the paper's RRR and DDD require it. It is not a hypothesis of the goal.
  • Infrastructure. A complete proof needs: inverse-transform or order-statistics facts for Beta laws (Fact 1); geometric expectations; Hoeffding's inequality for sums of Bernoulli variables (Mathlib has Hoeffding/Azuma); the binomial median theorem (Jogdeo–Samuels; Kaas–Buhrman); and the coupling from the reward tables to the per-arm i.i.d. output stacks the paper reasons with. Fact 1, Lemma 6 and Fact 2 are reusable beyond this mission. Contributions to any milestone are welcome, and so is a direct proof of the regret bound with an explicit constant.

Selected references

  • S. Agrawal and N. Goyal, Analysis of Thompson Sampling for the Multi-armed Bandit Problem, COLT 2012; arXiv:1111.1797v3. https://arxiv.org/abs/1111.1797
  • W. R. Thompson, On the likelihood that one unknown probability exceeds another in view of the evidence of two samples, Biometrika 25 (1933) 285–294. https://doi.org/10.2307/2332286
  • T. L. Lai and H. Robbins, Asymptotically efficient adaptive allocation rules, Advances in Applied Mathematics 6 (1985) 4–22. https://doi.org/10.1016/0196-8858(85)90002-8
  • P. Auer, N. Cesa-Bianchi and P. Fischer, Finite-time analysis of the multiarmed bandit problem, Machine Learning 47 (2002) 235–256. https://doi.org/10.1023/A:1013689704352
  • K. Jogdeo and S. M. Samuels, Monotone convergence of binomial probabilities and a generalization of Ramanujan's equation, Annals of Mathematical Statistics 39 (1968) 1191–1195. https://doi.org/10.1214/aoms/1177698243
  • R. Kaas and J. M. Buhrman, Mean, median and mode in binomial distributions, Statistica Neerlandica 34 (1980) 13–18. https://doi.org/10.1111/j.1467-9574.1980.tb00681.x
  • O. Chapelle and L. Li, An empirical evaluation of Thompson Sampling, NIPS 2011. https://papers.nips.cc/paper/4321-an-empirical-evaluation-of-thompson-sampling
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Algorithmic Game TheoryOperations ResearchOptimization·Captain: mikedeng1

Nonzero-Sum Stochastic Differential Games with Impulse Controls: A Verification Theorem with Applications 3: The Continuation Region Widens as the Fixed Intervention Cost GrowsResearch Paper

Motivation

In an impulse control problem a controller does not steer a process continuously: at times of its choosing it shifts the state by a finite jump, paying a fixed cost plus a cost proportional to the jump. Such models describe central-bank interventions on an exchange rate, inventory replenishment and cash management. Aïd, Basei, Callegaro, Campi and Vargiolu (Math. Oper. Res. 45(1), 2020; arXiv:1605.00039) study nonzero-sum games in which two players control the same diffusion by impulses. They prove a verification theorem for such games and apply it to a linear game whose Nash equilibria are explicit.

The paper's interpretation of the linear game is two central banks with different targets for an exchange rate. An explicit equilibrium gives explicit intervention thresholds, and Section 4.4 of the paper asks how these thresholds respond to the fixed cost of intervening. This mission formalizes that comparative-statics question: when intervening becomes more expensive, do the players intervene less?

Setting

The game of Section 4.1 has a discount rate ρ>0\rho > 0ρ>0, a volatility σ>0\sigma > 0σ>0, running payoffs f1(x)=x−s1f_1(x) = x - s_1f1​(x)=x−s1​ and f2(x)=s2−xf_2(x) = s_2 - xf2​(x)=s2​−x with s1<s2s_1 < s_2s1​<s2​, and intervention costs: a player who shifts the state by δ\deltaδ pays c+λ∣δ∣c + \lambda|\delta|c+λ∣δ∣ and the opponent receives c~+λ~∣δ∣\tilde c + \tilde\lambda|\delta|c~+λ~∣δ∣. The standing assumptions of the section are

c≥c~≥0,λ≥λ~≥0,(c,λ)≠(c~,λ~),1−λρ>0.c \ge \tilde c \ge 0,\qquad \lambda \ge \tilde\lambda \ge 0,\qquad (c,\lambda) \ne (\tilde c,\tilde\lambda),\qquad 1 - \lambda\rho > 0 .c≥c~≥0,λ≥λ~≥0,(c,λ)=(c~,λ~),1−λρ>0.

All parameters except the fixed cost ccc are held fixed. Set θ=2ρ/σ2\theta = \sqrt{2\rho/\sigma^2}θ=2ρ/σ2​ and η=(1−λρ)/ρ\eta = (1-\lambda\rho)/\rhoη=(1−λρ)/ρ, both positive. For c>0c > 0c>0 the function

Fc(y)=2y+θc−ηlog⁡η+yη−y,y∈(0,η),F_c(y) = 2y + \theta c - \eta\log\frac{\eta + y}{\eta - y},\qquad y \in (0,\eta),Fc​(y)=2y+θc−ηlogη−yη+y​,y∈(0,η),

has a unique zero ξ(c)∈(0,η)\xi(c) \in (0,\eta)ξ(c)∈(0,η). With

Γ(c)=θ(c−c~)4ξ(c)+θc(λ−λ~)4η ξ(c)+λ−λ~2η\Gamma(c) = \frac{\theta(c-\tilde c)}{4\xi(c)} + \frac{\theta c(\lambda-\tilde\lambda)}{4\eta\,\xi(c)} + \frac{\lambda-\tilde\lambda}{2\eta}Γ(c)=4ξ(c)θ(c−c~)​+4ηξ(c)θc(λ−λ~)​+2ηλ−λ~​

and a parameter s~∈R\tilde s \in \mathbb Rs~∈R, the paper's formulas (4.20) are

xˉi(c)=s~+(−1)iθlog⁡[η+ξη−ξ(Γ+1+Γ)],xi∗(c)=s~+(−1)iθlog⁡[η−ξη+ξ(Γ+1+Γ)],\bar x_i(c) = \tilde s + \frac{(-1)^i}{\theta}\log\left[\sqrt{\frac{\eta+\xi}{\eta-\xi}}\bigl(\sqrt{\Gamma+1}+\sqrt\Gamma\bigr)\right],\qquad x_i^*(c) = \tilde s + \frac{(-1)^i}{\theta}\log\left[\sqrt{\frac{\eta-\xi}{\eta+\xi}}\bigl(\sqrt{\Gamma+1}+\sqrt\Gamma\bigr)\right],xˉi​(c)=s~+θ(−1)i​log[η−ξη+ξ​​(Γ+1​+Γ​)],xi∗​(c)=s~+θ(−1)i​log[η+ξη−ξ​​(Γ+1​+Γ​)],

for i∈{1,2}i \in \{1,2\}i∈{1,2}, with ξ=ξ(c)\xi = \xi(c)ξ=ξ(c) and Γ=Γ(c)\Gamma = \Gamma(c)Γ=Γ(c). In the Nash equilibrium of the paper's Proposition 4.7, player 1 intervenes when the state falls below xˉ1\bar x_1xˉ1​ and moves it to x1∗x_1^*x1∗​; player 2 intervenes above xˉ2\bar x_2xˉ2​ and moves it to x2∗x_2^*x2∗​. The interval ]xˉ1(c),xˉ2(c)[]\bar x_1(c), \bar x_2(c)[]xˉ1​(c),xˉ2​(c)[ is the continuation region, where nobody intervenes. The equilibrium payoffs V1cV_1^cV1c​, V2cV_2^cV2c​ are explicit as well (4.27).

Formalization targets

Goal: Proposition 4.13

c↦xˉ2(c) is strictly increasing and c↦xˉ1(c) is strictly decreasing on ]c~,+∞[.c \mapsto \bar x_2(c)\ \text{is strictly increasing and}\ c \mapsto \bar x_1(c)\ \text{is strictly decreasing on}\ ]\tilde c, +\infty[ .c↦xˉ2​(c) is strictly increasing and c↦xˉ1​(c) is strictly decreasing on ]c~,+∞[.

The continuation region therefore widens strictly as the fixed cost grows. The statement concerns the explicit functions (4.20); that they are equilibrium thresholds is mission 2 of this series.

Milestones

  1. (4.17). For c>0c > 0c>0, ξ(c)\xi(c)ξ(c) is the unique zero of FcF_cFc​ in (0,η)(0,\eta)(0,η).
  2. (4.28). ξ∈C∞(]0,∞[)\xi \in C^\infty(]0,\infty[)ξ∈C∞(]0,∞[) with ξ′=θ2η2−ξ2ξ2\xi' = \frac\theta2\frac{\eta^2-\xi^2}{\xi^2}ξ′=2θ​ξ2η2−ξ2​ and ξ′′=−θη2ξ′ξ3=−θ2η22η2−ξ2ξ5\xi'' = -\theta\eta^2\frac{\xi'}{\xi^3} = -\frac{\theta^2\eta^2}{2}\frac{\eta^2-\xi^2}{\xi^5}ξ′′=−θη2ξ3ξ′​=−2θ2η2​ξ5η2−ξ2​.
  3. (4.29). ξ\xiξ, c/ξc/\xic/ξ and c ξ′c\,\xi'cξ′ tend to 000 as c→0+c \to 0^+c→0+; c(η−ξ)→0c(\eta-\xi) \to 0c(η−ξ)→0 and ξ→η\xi \to \etaξ→η as c→+∞c \to +\inftyc→+∞.
  4. Proposition 4.12. As c→+∞c \to +\inftyc→+∞, xˉ2,x1∗→+∞\bar x_2, x_1^* \to +\inftyxˉ2​,x1∗​→+∞, xˉ1,x2∗→−∞\bar x_1, x_2^* \to -\inftyxˉ1​,x2∗​→−∞, and pointwise V1c(x)→(x−s1)/ρV_1^c(x) \to (x-s_1)/\rhoV1c​(x)→(x−s1​)/ρ, V2c(x)→(s2−x)/ρV_2^c(x) \to (s_2-x)/\rhoV2c​(x)→(s2​−x)/ρ.
  5. Proposition 4.14 (with a corrected hypothesis, below). If c~=0\tilde c = 0c~=0, then x2∗x_2^*x2∗​ is strictly decreasing and x1∗x_1^*x1∗​ strictly increasing on ]0,∞[]0,\infty[]0,∞[; if moreover λ=λ~\lambda = \tilde\lambdaλ=λ~, then x2∗(c)<s~<x1∗(c)x_2^*(c) < \tilde s < x_1^*(c)x2∗​(c)<s~<x1∗​(c) for all c>0c > 0c>0.

Significance

Proposition 4.13 is the rigorous form of the economic intuition that costlier intervention makes players more patient. Together with Proposition 4.12 it describes the whole range of costs: the region of inaction grows strictly and invades the real line as c→∞c \to \inftyc→∞, where the payoffs converge to those of the uncontrolled Brownian motion. Proposition 4.14 adds that, when the fixed gain vanishes, the targets xi∗x_i^*xi∗​ move away from the centre s~\tilde ss~. The paper's numerical section shows that without c~=0\tilde c = 0c~=0 the targets need not be monotone.

The results are proved in the paper, in a few lines each, by differentiating the implicit function ξ(c)\xi(c)ξ(c). None of them is formalized. The mission produces a machine-checked treatment of a parametrised implicit function, c↦ξ(c)c \mapsto \xi(c)c↦ξ(c) defined by a transcendental equation: smoothness, explicit derivatives, and the asymptotics at both ends. On top of it, it gives a fully verified comparative-statics result for an explicit game equilibrium.

Difficulty

The thresholds depend on ccc only through ξ(c)\xi(c)ξ(c), which has no closed form, and through Γ(c)\Gamma(c)Γ(c), a sum of terms in c/ξ(c)c/\xi(c)c/ξ(c) and 1/ξ(c)1/\xi(c)1/ξ(c). Monotonicity of ξ\xiξ alone does not settle the goal: c/ξ(c)c/\xi(c)c/ξ(c) is a ratio of two increasing functions, and its direction is decided by how fast ξ\xiξ grows compared with ccc, uniformly on ]c~,∞[]\tilde c,\infty[]c~,∞[, including near c=0c = 0c=0, where F0F_0F0​ has no zero and ξ\xiξ degenerates. The limits as c→+∞c \to +\inftyc→+∞ need more than ξ(c)→η\xi(c) \to \etaξ(c)→η: Γ(c)\Gamma(c)Γ(c) grows linearly in ccc, so the rate at which η−ξ(c)\eta - \xi(c)η−ξ(c) decays decides whether the targets xi∗x_i^*xi∗​ diverge and whether the payoff coefficients vanish.

Formalization scope

The parameters ρ,σ,λ,λ~,c~,s~,s1,s2\rho, \sigma, \lambda, \tilde\lambda, \tilde c, \tilde s, s_1, s_2ρ,σ,λ,λ~,c~,s~,s1​,s2​ are bundled in a structure, and the standing assumptions not involving ccc in a predicate ρ>0\rho > 0ρ>0, σ>0\sigma > 0σ>0, s1<s2s_1 < s_2s1​<s2​, c~≥0\tilde c \ge 0c~≥0, λ≥λ~≥0\lambda \ge \tilde\lambda \ge 0λ≥λ~≥0, 1−λρ>01 - \lambda\rho > 01−λρ>0. θ\thetaθ and η\etaη are computed from ρ,σ,λ\rho, \sigma, \lambdaρ,σ,λ as in (4.21), not taken as free parameters. All quantities are real numbers.

ξ(c)\xi(c)ξ(c) is defined as sup⁡{y∈(0,η):Fc(y)≥0}\sup\{y \in (0,\eta) : F_c(y) \ge 0\}sup{y∈(0,η):Fc​(y)≥0}. Milestone 1 proves that this is the paper's unique zero for every c>0c > 0c>0. For c≤0c \le 0c≤0 the set is empty and the definition returns the placeholder 000. Every statement therefore restricts ccc to c>0c > 0c>0, to c>c~c > \tilde cc>c~, or to c→+∞c \to +\inftyc→+∞, and no statement can be satisfied through a junk value. On ]c~,∞[]\tilde c, \infty[]c~,∞[ one has Γ>0\Gamma > 0Γ>0, so the square roots in (4.20) are the paper's. "Increasing" and "decreasing" are read strictly, as the proofs give. C∞C^\inftyC∞ is ContDiffOn ℝ ∞, and ξ′\xi'ξ′ is deriv ξ. Limits at 0+0^+0+ use the right neighbourhood filter.

Two departures from the page are disclosed in the items:

  • c>0c > 0c>0 in (4.17). The standing assumptions allow c=0c = 0c=0 when c~=0\tilde c = 0c~=0 and λ>λ~\lambda > \tilde\lambdaλ>λ~, but then F0F_0F0​ has no zero; the paper's argument uses F(0+)=θc>0F(0^+) = \theta c > 0F(0+)=θc>0.
  • λ=λ~\lambda = \tilde\lambdaλ=λ~ in the last sentence of Proposition 4.14. For λ>λ~\lambda > \tilde\lambdaλ>λ~, Proposition 4.11 gives x2∗(0+)>s~x_2^*(0^+) > \tilde sx2∗​(0+)>s~ and the inequality x2∗<s~x_2^* < \tilde sx2∗​<s~ fails for small ccc. The monotonicity claims keep the hypothesis c~=0\tilde c = 0c~=0 alone.

A complete development needs the intermediate value theorem and strict monotonicity on an interval, a differentiable implicit (or inverse) function theorem in one variable, and asymptotic estimates of log⁡η+yη−y\log\frac{\eta+y}{\eta-y}logη−yη+y​ near 000 and near η\etaη. These one-variable lemmas about implicitly defined functions are reusable beyond this mission. Proofs of the milestones in any order are welcome.

Selected references

  • R. Aïd, M. Basei, G. Callegaro, L. Campi, T. Vargiolu, Nonzero-Sum Stochastic Differential Games with Impulse Controls: A Verification Theorem with Applications, Mathematics of Operations Research 45(1), 2020. https://doi.org/10.1287/moor.2019.0989 — accepted manuscript arXiv:1605.00039v4, https://arxiv.org/abs/1605.00039
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Control TheoryMechanism DesignOperations Research+1·Captain: mikedeng1

Optimal Electricity Demand Response Contracting with Responsiveness Incentives 1: The Producer's Second-Best Value in Closed FormResearch Paper

Motivation

Demand response asks electricity consumers to lower or smooth their consumption when generation is expensive, in exchange for payments. Field trials such as Low Carbon London showed two effects of such incentives: consumers reduce their average consumption, and the variability of their response depends on how much effort they put into it. A producer who cannot observe the consumer's individual usages, only the aggregate consumption path, faces a moral hazard problem: the payment can depend only on what is observed.

Aïd, Possamaï and Touzi (arXiv:1810.09063v3, 2019; Math. Oper. Res. 2022) cast this as a continuous-time principal–agent problem in which the consumer controls both the drift and the volatility of his consumption, and the producer pays for reductions in both. The volatility channel is what makes the problem new: the classical Holmström–Milgrom model (Econometrica 1987) controls only the drift. The paper uses the general reduction of Cvitanić, Possamaï and Touzi (Finance Stoch. 2018) to optimal contracts with volatility control, and obtains the producer's value in closed form up to a scalar minimisation. This mission formalizes that closed form.

Setting

Fix integers N,d≥0N,d\ge0N,d≥0, cost parameters μ∈(0,∞)N\mu\in(0,\infty)^Nμ∈(0,∞)N and λ∈(0,∞)d\lambda\in(0,\infty)^dλ∈(0,∞)d, nominal volatilities σ∈(0,∞)d\sigma\in(0,\infty)^dσ∈(0,∞)d, effort bounds Amax⁡>0A_{\max}>0Amax​>0 and ε∈(0,1]\varepsilon\in(0,1]ε∈(0,1], risk aversions r,p>0r,p>0r,p>0, a marginal cost of volatility h>0h>0h>0, marginal energy value κ\kappaκ and cost θ\thetaθ with δ:=κ−θ\delta:=\kappa-\thetaδ:=κ−θ, a horizon T>0T>0T>0, an initial consumption X0X_0X0​ and a reservation utility R0<0R_0<0R0​<0. Write μˉ:=∑iμi\bar\mu:=\sum_i\mu_iμˉ​:=∑i​μi​ and x−:=max⁡(0,−x)x^-:=\max(0,-x)x−:=max(0,−x).

Consumption. XXX is the canonical process on Ω=C([0,T],R)\Omega=C([0,T],\mathbb R)Ω=C([0,T],R) with its natural filtration F\mathbb FF. A control ν=(α,β)\nu=(\alpha,\beta)ν=(α,β) is progressively measurable, with αt∈A:=∏i[0,μiAmax⁡]\alpha_t\in A:=\prod_i[0,\mu_iA_{\max}]αt​∈A:=∏i​[0,μi​Amax​] (effort to reduce consumption) and βt∈B:=[ε,1]d\beta_t\in B:=[\varepsilon,1]^dβt​∈B:=[ε,1]d (effort to reduce volatility). Under ν\nuν the consumption follows, in the weak sense,

Xt=X0−∫0tαs⋅1 ds+∫0tσ(βs)⋅dWs,∣σ(b)∣2=∑jσj2bj.X_t=X_0-\int_0^t\alpha_s\cdot\mathbf 1\,ds+\int_0^t\sigma(\beta_s)\cdot dW_s,\qquad |\sigma(b)|^2=\sum_j\sigma_j^2b_j .Xt​=X0​−∫0t​αs​⋅1ds+∫0t​σ(βs​)⋅dWs​,∣σ(b)∣2=j∑​σj2​bj​.

Effort costs c(ν)=c1(α)+12c2(β)c(\nu)=c_1(\alpha)+\frac12c_2(\beta)c(ν)=c1​(α)+21​c2​(β) per unit time, with c1(a)=12∑iai2/μic_1(a)=\frac12\sum_ia_i^2/\mu_ic1​(a)=21​∑i​ai2​/μi​ and c2(b)=∑jσj2λj(bj−1−1)c_2(b)=\sum_j\frac{\sigma_j^2}{\lambda_j}(b_j^{-1}-1)c2​(b)=∑j​λj​σj2​​(bj−1​−1).

Criteria. For a payment ξ\xiξ at time TTT, the consumer's criterion is JA=E[−e−r(ξ+∫0T(κXs−c(νs))ds)]J_A=\mathbb E[-e^{-r(\xi+\int_0^T(\kappa X_s-c(\nu_s))ds)}]JA​=E[−e−r(ξ+∫0T​(κXs​−c(νs​))ds)] and the producer's is JP=E[U(−ξ−∫0TθXsds−h2⟨X⟩T)]J_P=\mathbb E[U(-\xi-\int_0^T\theta X_sds-\frac h2\langle X\rangle_T)]JP​=E[U(−ξ−∫0T​θXs​ds−2h​⟨X⟩T​)] with U(x)=−e−pxU(x)=-e^{-px}U(x)=−e−px. Contracts C\mathcal CC are the FT\mathcal F_TFT​-measurable ξ\xiξ with exponential moments of order m>1m>1m>1 uniformly over the consumer's responses (2.5). The consumer's value is VA(ξ)=sup⁡JAV_A(\xi)=\sup J_AVA​(ξ)=supJA​, and P⋆(ξ)\mathcal P^\star(\xi)P⋆(ξ) is the set of his optimal responses.

Second best. The producer offers ξ\xiξ, the consumer responds optimally, ties are broken in the producer's favour, and participation requires VA(ξ)≥R0V_A(\xi)\ge R_0VA​(ξ)≥R0​:

VSB:=sup⁡ξ∈C, VA(ξ)≥R0 sup⁡P⋆(ξ)JP(ξ,⋅),sup⁡∅=−∞.V^{SB}:=\sup_{\xi\in\mathcal C,\ V_A(\xi)\ge R_0}\ \sup_{\mathcal P^\star(\xi)}J_P(\xi,\cdot),\qquad\sup\emptyset=-\infty .VSB:=ξ∈C, VA​(ξ)≥R0​sup​ P⋆(ξ)sup​JP​(ξ,⋅),sup∅=−∞.

Hamiltonians. Hm(z)=−inf⁡a∈A{a⋅1 z+c1(a)}H_m(z)=-\inf_{a\in A}\{a\cdot\mathbf 1\,z+c_1(a)\}Hm​(z)=−infa∈A​{a⋅1z+c1​(a)} and Hv(γ)=−12inf⁡b∈B{c2(b)−γ∣σ(b)∣2}H_v(\gamma)=-\frac12\inf_{b\in B}\{c_2(b)-\gamma|\sigma(b)|^2\}Hv​(γ)=−21​infb∈B​{c2​(b)−γ∣σ(b)∣2}.

Formalization targets

Goal: Proposition 3.2 (i)

Assume δ−T≤Amax⁡\delta^-T\le A_{\max}δ−T≤Amax​. With qt(z)=h+rz2+p(z−δ(T−t))2q_t(z)=h+rz^2+p(z-\delta(T-t))^2qt​(z)=h+rz2+p(z−δ(T−t))2, L0=−1rlog⁡(−R0)L_0=-\frac1r\log(-R_0)L0​=−r1​log(−R0​),

mSB(t)=12μˉδ2(T−t)2−12inf⁡z∈R{μˉ(z−+δ(T−t))2−2Hv(−qt(z))},m_{SB}(t)=\frac12\bar\mu\delta^2(T-t)^2-\frac12\inf_{z\in\mathbb R}\Big\{\bar\mu\big(z^-+\delta(T-t)\big)^2-2H_v\big(-q_t(z)\big)\Big\},mSB​(t)=21​μˉ​δ2(T−t)2−21​z∈Rinf​{μˉ​(z−+δ(T−t))2−2Hv​(−qt​(z))}, VSB=U(v(0,X0)−L0),v(0,X0)=δTX0+∫0TmSB(s) ds.V^{SB}=U\big(v(0,X_0)-L_0\big),\qquad v(0,X_0)=\delta TX_0+\int_0^Tm_{SB}(s)\,ds .VSB=U(v(0,X0​)−L0​),v(0,X0​)=δTX0​+∫0T​mSB​(s)ds.

Milestones

  1. Proposition 2.1. The consumer's best responses a^i(z)=μi(z−∧Amax⁡)\hat a_i(z)=\mu_i(z^-\wedge A_{\max})a^i​(z)=μi​(z−∧Amax​) and b^j(γ)=(1∧(λjγ−)−1/2)∨ε\hat b_j(\gamma)=(1\wedge(\lambda_j\gamma^-)^{-1/2})\vee\varepsilonb^j​(γ)=(1∧(λj​γ−)−1/2)∨ε attain the infima defining HmH_mHm​ and HvH_vHv​, and
Hm(z)=μˉ(mz−−m22), m=z−∧Amax⁡;Hv(γ)=−12(c^2(γ)−γ∣σ^(γ)∣2).H_m(z)=\bar\mu\big(m z^--\tfrac{m^2}2\big),\ m=z^-\wedge A_{\max};\qquad H_v(\gamma)=-\tfrac12\big(\hat c_2(\gamma)-\gamma|\hat\sigma(\gamma)|^2\big).Hm​(z)=μˉ​(mz−−2m2​), m=z−∧Amax​;Hv​(γ)=−21​(c^2​(γ)−γ∣σ^(γ)∣2).
  1. Lemma A.1. With f0(q,γ)=q∣σ^(γ)∣2+c^2(γ)f_0(q,\gamma)=q|\hat\sigma(\gamma)|^2+\hat c_2(\gamma)f0​(q,γ)=q∣σ^(γ)∣2+c^2​(γ), F0(q):=inf⁡γ≤0f0(q,γ)=f0(q,−q)=−2Hv(−q)F_0(q):=\inf_{\gamma\le0}f_0(q,\gamma)=f_0(q,-q)=-2H_v(-q)F0​(q):=infγ≤0​f0​(q,γ)=f0​(q,−q)=−2Hv​(−q), and F0F_0F0​ is non-decreasing.
  2. Proposition A.4 (ii). A minimiser of z↦F0(h−k+rz2+p(z−y)2)+μˉ(z−+y)2z\mapsto F_0(h-k+rz^2+p(z-y)^2)+\bar\mu(z^-+y)^2z↦F0​(h−k+rz2+p(z−y)2)+μˉ​(z−+y)2 is pr+py\frac p{r+p}yr+pp​y when y≥0y\ge0y≥0, and lies in [y,pr+py][y,\frac p{r+p}y][y,r+pp​y] when y≤0y\le0y≤0.

A companion statement, Corollary 3.1 (i), gives the explicit off-peak payment rates zSB(t)=pr+pδ(T−t)z_{SB}(t)=\frac p{r+p}\delta(T-t)zSB​(t)=r+pp​δ(T−t) and γSB(t)=−h−rpr+pδ2(T−t)2\gamma_{SB}(t)=-h-\frac{rp}{r+p}\delta^2(T-t)^2γSB​(t)=−h−r+prp​δ2(T−t)2 when δ≥0\delta\ge0δ≥0.

Significance

The closed form reduces an infinite-dimensional contracting problem, a supremum over all path-dependent payments and all consumer responses, to a deterministic one-dimensional minimisation at each time. It is the basis of the paper's comparisons: with the first-best value it measures the cost of moral hazard, and its minimiser gives the price of energy and of responsiveness that the optimal contract charges, which the paper calibrates on Low Carbon London data.

The result is proved on paper. No part of it is machine-checked. A complete formalization would give a checked instance of a continuous-time principal–agent theorem with volatility control. It would also fix, in exact terms, the conventions the paper leaves implicit (weak solutions, the effort cap), and the printed misprints that this mission corrects.

Difficulty

The deterministic milestones are calculus on boxes. The goal is not. The upper bound VSB≤U(v(0,X0)−L0)V^{SB}\le U(v(0,X_0)-L_0)VSB≤U(v(0,X0​)−L0​) must hold for every FT\mathcal F_TFT​-measurable contract, not only for contracts of a convenient form. The step that fails in a direct attempt is the representation of an arbitrary contract: one needs that every ξ∈C\xi\in\mathcal Cξ∈C inducing an optimal response can be written as YTy0,Z,ΓY_T^{y_0,Z,\Gamma}YTy0​,Z,Γ​, an integral against dXdXdX and d⟨X⟩d\langle X\rangled⟨X⟩ driven by the consumer's continuation certainty equivalent. This is the main theorem of Cvitanić–Possamaï–Touzi (2018) and rests on second-order backward SDEs; it has no counterpart in Mathlib. Restricting the supremum to linear or representable contracts at the outset would assume exactly that theorem. The lower bound needs, for the candidate contract, existence of the consumer's optimal response as a weak solution and a verification argument for the producer's HJB equation.

Formalization scope

All objects live in the namespace DemandResponse.SecondBest, and all hypotheses are fields of a structure Params. Conventions:

  • Weak formulation. An admissible pair (ν,P)(\nu,\mathbb P)(ν,P) is a control and a probability measure on C([0,T],R)C([0,T],\mathbb R)C([0,T],R) with X0=X0X_0=X_0X0​=X0​ a.s., under which Xt−X0+∫0tαs⋅1 dsX_t-X_0+\int_0^t\alpha_s\cdot\mathbf 1\,dsXt​−X0​+∫0t​αs​⋅1ds and its square minus ∫0t∣σ(βs)∣2ds\int_0^t|\sigma(\beta_s)|^2ds∫0t​∣σ(βs​)∣2ds are F\mathbb FF-martingales. This is the martingale problem equivalent to weak solutions of (2.1); the paper deliberately leaves weak solutions informal (footnote 2). The pair, not the law alone, is the admissible object, because the cost depends on ν\nuν.
  • Quadratic variation. ⟨X⟩T\langle X\rangle_T⟨X⟩T​ in JPJ_PJP​ is its almost-sure value ∫0T∣σ(βs)∣2ds\int_0^T|\sigma(\beta_s)|^2ds∫0T​∣σ(βs​)∣2ds.
  • Values. Expected utilities are negated lower Lebesgue integrals, in [−∞,0][-\infty,0][−∞,0]; all suprema are in the extended reals, so the empty supremum is −∞-\infty−∞, as on p. 9.
  • Hamiltonians are defined by their infima, not by the closed forms of Proposition 2.1.
  • Indices are Fin N, Fin d; N=0N=0N=0, d=0d=0d=0 are allowed. b^j(γ)=1\hat b_j(\gamma)=1b^j​(γ)=1 when λjγ−≤1\lambda_j\gamma^-\le1λj​γ−≤1 (the paper's 0−1/2=+∞0^{-1/2}=+\infty0−1/2=+∞).
  • Added hypotheses. ε≤1\varepsilon\le1ε≤1 (B≠∅B\neq\emptysetB=∅), R0<0R_0<0R0​<0 (log⁡(−R0)\log(-R_0)log(−R0​) defined), and for the goal δ−T≤Amax⁡\delta^-T\le A_{\max}δ−T≤Amax​. The paper's closed form is computed with the effort cap removed ("ηA→0\eta_A\to0ηA​→0 as A↗∞A\nearrow\inftyA↗∞", p. 30), and with the capped effort of the model it is correct exactly under this hypothesis.
  • Corrected misprints. −2Hm(−q(z))-2H_m(-q(z))−2Hm​(−q(z)) in mSBm_{SB}mSB​ is read as −2Hv(−q(z))-2H_v(-q(z))−2Hv​(−q(z)); with HmH_mHm​ the infimum is −∞-\infty−∞. The printed Hm(z)=12μˉ(z−∧Amax⁡)2H_m(z)=\frac12\bar\mu(z^-\wedge A_{\max})^2Hm​(z)=21​μˉ​(z−∧Amax​)2 is false for z−>Amax⁡z^->A_{\max}z−>Amax​ and is corrected. "j=1,…,Nj=1,\dots,Nj=1,…,N" for b^\hat bb^ means j=1,…,dj=1,\dots,dj=1,…,d. In Proposition A.4 (ii) the open interval becomes closed, and "for large AAA" is read as ηA≡0\eta_A\equiv0ηA​≡0.

The goal is an equality of extended reals between VSBV^{SB}VSB, defined from the model, and an explicit real number. A formalization that defines VSBV^{SB}VSB over a restricted class of contracts, or with a real-valued supremum that returns 000 on unbounded sets, would trivialize or change it and is not the goal.

Needed infrastructure: continuous-time martingales on the canonical path space (Mathlib has Martingale and progressive measurability), existence of weak solutions with bounded coefficients, a representation theorem for contracts (Cvitanić–Possamaï–Touzi), and a verification theorem for the producer's HJB equation. The weak-formulation layer and the contract representation are reusable for any continuous-time principal–agent model with drift and volatility control. Contributions of any of these pieces, and proofs of the deterministic milestones, are welcome.

Selected references

  • R. Aïd, D. Possamaï, N. Touzi, Optimal Electricity Demand Response Contracting with Responsiveness Incentives, arXiv:1810.09063v3, 2019; Mathematics of Operations Research 47 (2022). https://arxiv.org/abs/1810.09063v3
  • J. Cvitanić, D. Possamaï, N. Touzi, Dynamic programming approach to principal–agent problems, Finance and Stochastics 22 (2018) 1–37. https://doi.org/10.1007/s00780-017-0344-4
  • B. Holmström, P. Milgrom, Aggregation and Linearity in the Provision of Intertemporal Incentives, Econometrica 55 (1987) 303–328. https://doi.org/10.2307/1913238
  • Y. Sannikov, A Continuous-Time Version of the Principal–Agent Problem, Review of Economic Studies 75 (2008) 957–984. https://doi.org/10.1111/j.1467-937X.2008.00486.x
  • I. Karatzas, S. Shreve, Brownian Motion and Stochastic Calculus, 2nd ed., Springer 1991, §5.4 (martingale problem and weak solutions). https://doi.org/10.1007/978-1-4612-0949-2
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Optimal Electricity Demand Response Contracting with Responsiveness Incentives 2: The Producer's First-Best Value in Closed FormResearch Paper

Motivation

Electricity demand response asks consumers to lower their consumption during price events, when generation is expensive or scarce. Field trials such as the Low Carbon London experiment showed that consumers do react to price signals, but that the reaction is erratic: the average consumption falls while its variability stays high, and a producer that has to follow the load curve in real time pays for that variability. Aïd, Possamaï and Touzi (arXiv:1810.09063; Math. Oper. Res. 2022, doi:10.1287/moor.2021.1201) model this as a continuous-time principal–agent problem in which the consumer (the agent) controls both the level and the volatility of consumption, and the producer (the principal) designs a payment that rewards both.

The paper compares two benchmarks. In the second best, the producer observes only the consumption path and the consumer responds optimally to the contract; this is the subject of the companion mission of this series. In the first best, the producer dictates both the contract and the consumer's effort, subject only to the consumer's participation. The first best is the reference point against which the cost of moral hazard, the information rent, is measured. This mission formalizes the first-best value in closed form, Proposition 3.1 (i) of the paper.

The methodology follows the continuous-time principal–agent literature: Holmström and Milgrom (1987) for exponential utilities and linear contracts, Sannikov (2008) for the dynamic-programming view of the agent's continuation value, and Cvitanić, Possamaï and Touzi (2018) for contracts indexed on both the output and its quadratic variation.

Setting

Fix integers N,d≥0N,d\ge0N,d≥0 (usages for the mean effort and for the volatility effort), cost parameters μ∈(0,∞)N\mu\in(0,\infty)^Nμ∈(0,∞)N, λ∈(0,∞)d\lambda\in(0,\infty)^dλ∈(0,∞)d, nominal volatilities σ∈(0,∞)d\sigma\in(0,\infty)^dσ∈(0,∞)d, effort bounds Amax⁡>0A_{\max}>0Amax​>0 and 0<ε≤10<\varepsilon\le10<ε≤1, risk aversions r,p>0r,p>0r,p>0, a marginal volatility cost h>0h>0h>0, slopes κ,θ∈R\kappa,\theta\in\mathbb Rκ,θ∈R, a horizon T>0T>0T>0, an initial consumption X0∈RX_0\in\mathbb RX0​∈R and a reservation utility R0<0R_0<0R0​<0.

The consumer chooses a mean effort α\alphaα with values in A=∏i[0,μiAmax⁡]A=\prod_i[0,\mu_iA_{\max}]A=∏i​[0,μi​Amax​] and a responsiveness effort β\betaβ with values in B=[ε,1]dB=[\varepsilon,1]^dB=[ε,1]d, at cost

c(α,β)=c1(α)+12c2(β),c1(a)=12∑iai2μi,c2(b)=∑jσj2λj(bj−1−1).c(\alpha,\beta)=c_1(\alpha)+\tfrac12c_2(\beta),\qquad c_1(a)=\tfrac12\sum_i\frac{a_i^2}{\mu_i},\qquad c_2(b)=\sum_j\frac{\sigma_j^2}{\lambda_j}\big(b_j^{-1}-1\big).c(α,β)=c1​(α)+21​c2​(β),c1​(a)=21​i∑​μi​ai2​​,c2​(b)=j∑​λj​σj2​​(bj−1​−1).

The consumption XXX follows Xt=X0−∫0tαs⋅1 ds+∫0tσ(βs)⋅dWsX_t=X_0-\int_0^t\alpha_s\cdot\mathbf 1\,ds+\int_0^t\sigma(\beta_s)\cdot dW_sXt​=X0​−∫0t​αs​⋅1ds+∫0t​σ(βs​)⋅dWs​ with σ(b)=(σ1b1,…,σdbd)\sigma(b)=(\sigma_1\sqrt{b_1},\dots,\sigma_d\sqrt{b_d})σ(b)=(σ1​b1​​,…,σd​bd​​), in the weak sense: XXX is the canonical process on C([0,T],R)C([0,T],\mathbb R)C([0,T],R), and an admissible pair (ν,P)(\nu,\mathbb P)(ν,P) is a progressively measurable control ν=(α,β)\nu=(\alpha,\beta)ν=(α,β) with a probability measure under which XXX starts at X0X_0X0​ and solves the associated martingale problem.

The consumer values consumption by f(x)=κxf(x)=\kappa xf(x)=κx and the producer bears the generation cost g(x)=θxg(x)=\theta xg(x)=θx; write δ=κ−θ\delta=\kappa-\thetaδ=κ−θ. For a payment ξ\xiξ made at time TTT, the consumer's and the producer's criteria are

JA=EP[−e−r(ξ+∫0T(κXs−c(νs))ds)],JP=EP[−e−p(−ξ−∫0TθXsds−h2⟨X⟩T)].J_A=\mathbb E^{\mathbb P}\Big[-e^{-r\left(\xi+\int_0^T(\kappa X_s-c(\nu_s))ds\right)}\Big],\qquad J_P=\mathbb E^{\mathbb P}\Big[-e^{-p\left(-\xi-\int_0^T\theta X_sds-\frac h2\langle X\rangle_T\right)}\Big].JA​=EP[−e−r(ξ+∫0T​(κXs​−c(νs​))ds)],JP​=EP[−e−p(−ξ−∫0T​θXs​ds−2h​⟨X⟩T​)].

A contract is an FT\mathcal F_TFT​-measurable ξ\xiξ with uniform exponential moments (2.5). The first-best value is

VFB=sup⁡{JP(ξ,ν,P): ξ a contract, (ν,P) admissible, JA(ξ,ν,P)≥R0}.V^{FB}=\sup\big\{J_P(\xi,\nu,\mathbb P):\ \xi\text{ a contract},\ (\nu,\mathbb P)\text{ admissible},\ J_A(\xi,\nu,\mathbb P)\ge R_0\big\}.VFB=sup{JP​(ξ,ν,P): ξ a contract, (ν,P) admissible, JA​(ξ,ν,P)≥R0​}.

The consumer's Hamiltonians are Hm(z)=−inf⁡a∈A{a⋅1 z+c1(a)}H_m(z)=-\inf_{a\in A}\{a\cdot\mathbf 1\,z+c_1(a)\}Hm​(z)=−infa∈A​{a⋅1z+c1​(a)} and Hv(γ)=−12inf⁡b∈B{c2(b)−γ∣σ(b)∣2}H_v(\gamma)=-\frac12\inf_{b\in B}\{c_2(b)-\gamma|\sigma(b)|^2\}Hv​(γ)=−21​infb∈B​{c2​(b)−γ∣σ(b)∣2}. Finally ρ=rpr+p\rho=\frac{rp}{r+p}ρ=r+prp​, L0=−1rlog⁡(−R0)L_0=-\frac1r\log(-R_0)L0​=−r1​log(−R0​), U(x)=−e−pxU(x)=-e^{-px}U(x)=−e−px, μˉ=∑iμi\bar\mu=\sum_i\mu_iμˉ​=∑i​μi​ and x−=max⁡(0,−x)x^-=\max(0,-x)x−=max(0,−x).

Formalization targets

Goal: Proposition 3.1 (i)

Assume δ−T≤Amax⁡\delta^-T\le A_{\max}δ−T≤Amax​. Then

VFB=U(vˉ(0,X0)−L0),vˉ(0,X0)=δTX0+∫0T(12μˉ(δ−)2(T−t)2+Hv(−h−ρδ2(T−t)2))dt.V^{FB}=U\big(\bar v(0,X_0)-L_0\big),\quad \bar v(0,X_0)=\delta TX_0+\int_0^T\Big(\tfrac12\bar\mu(\delta^-)^2(T-t)^2+H_v\big(-h-\rho\delta^2(T-t)^2\big)\Big)dt.VFB=U(vˉ(0,X0​)−L0​),vˉ(0,X0​)=δTX0​+∫0T​(21​μˉ​(δ−)2(T−t)2+Hv​(−h−ρδ2(T−t)2))dt.

Milestones

  1. Proposition 2.1. The best responses a^(z)\hat a(z)a^(z), b^(γ)\hat b(\gamma)b^(γ) attain the infima defining HmH_mHm​, HvH_vHv​, and these Hamiltonians have explicit closed forms.
  2. (A.5). The auxiliary value Vˉ=sup⁡(ν,P)EP[−e−ρ(∫0T(δXt−c(νt))dt−h2⟨X⟩T)]\bar V=\sup_{(\nu,\mathbb P)}\mathbb E^{\mathbb P}\big[-e^{-\rho(\int_0^T(\delta X_t-c(\nu_t))dt-\frac h2\langle X\rangle_T)}\big]Vˉ=sup(ν,P)​EP[−e−ρ(∫0T​(δXt​−c(νt​))dt−2h​⟨X⟩T​)] is finite and negative, and VFB=R0(Vˉ/R0)1+p/rV^{FB}=R_0(\bar V/R_0)^{1+p/r}VFB=R0​(Vˉ/R0​)1+p/r.
  3. Proposition A.3 (i), with the explicit solution of p. 28.
Vˉ=−e−ρ(δTX0+∫0Tmˉ(t)dt),mˉ(t)=Hm(δ(T−t))+Hv(−h−ρδ2(T−t)2).\bar V=-e^{-\rho\left(\delta TX_0+\int_0^T\bar m(t)dt\right)},\qquad \bar m(t)=H_m(\delta(T-t))+H_v\big(-h-\rho\delta^2(T-t)^2\big).Vˉ=−e−ρ(δTX0​+∫0T​mˉ(t)dt),mˉ(t)=Hm​(δ(T−t))+Hv​(−h−ρδ2(T−t)2).

Significance

The closed form shows how the first-best value depends on each parameter: on the energy value discrepancy δ\deltaδ through the mean-effort term, on the volatility cost hhh and the effective risk aversion ρ\rhoρ through the volatility Hamiltonian, and on the reservation utility only through the shift by L0L_0L0​. It is one half of the paper's information rent (Proposition 3.4), the gap between the first- and second-best values, and it is the benchmark against which the calibrated contracts of the paper's Section 4 are judged.

The result is proved in the paper, partly by appeal to standard stochastic control arguments. To our knowledge it has no machine-checked proof. A formal proof requires a verification theorem for an exponential-utility control problem in the weak formulation, and a risk-sharing argument with a pathwise quadratic-variation term in the contract; both are reusable beyond this paper.

Difficulty

The deterministic parts, Proposition 2.1 and the algebra that turns (A.5) and the value of Vˉ\bar VVˉ into the goal, are calculus. The difficulty lies in the two stochastic steps. In (A.5), the producer's optimal payment for a given effort depends on ⟨X⟩T\langle X\rangle_T⟨X⟩T​; it must be realised as a measurable function of the path that is a contract in the sense of (2.5), uniformly over all admissible laws, and the participation constraint must be shown to bind. In Proposition A.3 (i), the upper bound on Vˉ\bar VVˉ must hold for every progressively measurable, path-dependent control, not only for Markov feedback controls; the paper invokes "standard stochastic control theory", which has to be made precise for controls of the volatility under a martingale-problem formulation, where no Brownian motion is given in advance.

Formalization scope

The canonical space is C([0,T],R)C([0,T],\mathbb R)C([0,T],R) with the coordinate σ-algebra and the canonical filtration; processes are indexed by [0,T][0,T][0,T]. Admissible pairs are given by a martingale problem: X0=X0X_0=X_0X0​=X0​ almost surely, and both Xt−X0+∫0tαs⋅1 dsX_t-X_0+\int_0^t\alpha_s\cdot\mathbf 1\,dsXt​−X0​+∫0t​αs​⋅1ds and its square minus ∫0t∣σ(βs)∣2ds\int_0^t|\sigma(\beta_s)|^2ds∫0t​∣σ(βs​)∣2ds are martingales. In the criteria, ⟨X⟩T\langle X\rangle_T⟨X⟩T​ is replaced by its almost-sure value ∫0T∣σ(βs)∣2ds\int_0^T|\sigma(\beta_s)|^2ds∫0T​∣σ(βs​)∣2ds; a contract remains any FT\mathcal F_TFT​-measurable function of the path. Expectations of utilities are negated lower Lebesgue integrals of exponentials in [−∞,0][-\infty,0][−∞,0], and every value is an extended-real supremum with sup⁡∅=−∞\sup\emptyset=-\inftysup∅=−∞. BBB is read as [ε,1]d[\varepsilon,1]^d[ε,1]d, with indices in Fin N and Fin d.

The Hamiltonians are defined by their infima, never by their closed forms, so that Proposition 2.1 is not true by definition, and the first-best value is a supremum over the model's own objects, not a variable pinned by hypotheses. Three hypotheses are added to the page: ε≤1\varepsilon\le1ε≤1 (so B≠∅B\ne\emptysetB=∅), R0<0R_0<0R0​<0 (so L0L_0L0​ is defined), and, for the goal only, δ−T≤Amax⁡\delta^-T\le A_{\max}δ−T≤Amax​, without which the printed 12μˉ(δ−)2(T−t)2\frac12\bar\mu(\delta^-)^2(T-t)^221​μˉ​(δ−)2(T−t)2 exceeds Hm(δ(T−t))H_m(\delta(T-t))Hm​(δ(T−t)) and contradicts the paper's own proof. Misprints corrected and disclosed in the items: the closed form of HmH_mHm​ in Proposition 2.1 is false for z−>Amax⁡z^->A_{\max}z−>Amax​ and is replaced by μˉ(mz−−m2/2)\bar\mu(m z^--m^2/2)μˉ​(mz−−m2/2) with m=z−∧Amax⁡m=z^-\wedge A_{\max}m=z−∧Amax​; the index range of b^\hat bb^ is j=1,…,dj=1,\dots,dj=1,…,d; on p. 28, ∫0tmˉ\int_0^t\bar m∫0t​mˉ is ∫tTmˉ\int_t^T\bar m∫tT​mˉ and "(A.11)" is (A.6).

The parts (ii)–(iii) of Proposition 3.1, the optimal efforts and the optimal contract, are not stated. Contributions welcome: a verification theorem for controlled martingale problems with bounded coefficients, exponential moment bounds uniform over admissible laws, and a pathwise quadratic variation on the canonical space.

Selected references

  • R. Aïd, D. Possamaï, N. Touzi, Optimal electricity demand response contracting with responsiveness incentives, arXiv:1810.09063v3, 2019; Math. Oper. Res. 2022. https://arxiv.org/abs/1810.09063
  • J. Cvitanić, D. Possamaï, N. Touzi, Dynamic programming approach to principal–agent problems, Finance Stoch. 22, 2018. https://arxiv.org/abs/1510.07111
  • B. Holmström, P. Milgrom, Aggregation and linearity in the provision of intertemporal incentives, Econometrica 55, 1987. https://doi.org/10.2307/1913238
  • Y. Sannikov, A continuous-time version of the principal–agent problem, Rev. Econ. Stud. 75, 2008. https://doi.org/10.1111/j.1467-937X.2007.00463.x
  • I. Karatzas, S. Shreve, Brownian Motion and Stochastic Calculus, Springer, 1991, §5.4 (martingale problems and weak solutions). https://doi.org/10.1007/978-1-4612-0949-2
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Algorithmic Game TheoryOperations ResearchProbability·Captain: mikedeng1

Correlated Equilibrium as an Expression of Bayesian Rationality I: Bayes Rationality at Every State Yields Exactly the Correlated Equilibrium DistributionsResearch Paper

Motivation

Nash equilibrium is the standard solution concept for strategic games, but it is usually justified by appeal to what players "would" do once they somehow coordinate on a profile. Correlated equilibrium, introduced by Aumann (J. Math. Econ. 1, 1974), enlarges the set of outcomes by letting players condition their actions on correlated private signals. In Correlated Equilibrium as an Expression of Bayesian Rationality (Econometrica 55, 1987), Aumann gave the concept a decision-theoretic foundation: if the players share a common prior over the states of the world and each player maximizes expected utility given his information at every state, then what they play is a correlated equilibrium — and every correlated equilibrium arises this way. The result is a standard entry point to the epistemic foundations of game theory, and correlated equilibria are central in algorithmic game theory because no-swap-regret learning dynamics converge to them (Foster–Vohra 1997; Hart–Mas-Colell 2000).

Timeline:

  • 1974, Aumann: correlated equilibrium defined, in a measure-theoretic model with subjective probabilities and information σ-fields.
  • 1987, Aumann: the Main Theorem (Bayes rationality at every state under a common prior implies correlated equilibrium play) and its converse, in a finite model with information partitions.

Setting

A game GGG in strategic form has players iii, action sets SiS^iSi, action nnn-tuples s∈S=S1×⋯×Sns\in S=S^1\times\dots\times S^ns∈S=S1×⋯×Sn, and payoffs hi(s)∈Rh^i(s)\in\mathbb Rhi(s)∈R.

A correlated strategy nnn-tuple is a function f:Γ→Sf:\Gamma\to Sf:Γ→S on a finite probability space (Γ,q)(\Gamma,q)(Γ,q), with q≥0q\ge 0q≥0 and ∑γq(γ)=1\sum_\gamma q(\gamma)=1∑γ​q(γ)=1. Its expected payoff is Ehi(f)=∑γq(γ)hi(f(γ))Eh^i(f)=\sum_\gamma q(\gamma)h^i(f(\gamma))Ehi(f)=∑γ​q(γ)hi(f(γ)). For gi:Γ→Sig^i:\Gamma\to S^igi:Γ→Si, the profile (f−i,gi)(f^{-i},g^i)(f−i,gi) replaces player iii's coordinate of fff by gig^igi. The function fff is a correlated equilibrium (Definition 2.1) if

Ehi(f) ≥ Ehi(f−i,gi)(2.2)Eh^i(f)\ \ge\ Eh^i(f^{-i},g^i)\qquad(2.2)Ehi(f) ≥ Ehi(f−i,gi)(2.2)

for every player iii and every gig^igi that is a function of fif^ifi (i.e. gi=φ∘fig^i=\varphi\circ f^igi=φ∘fi). The distribution of fff assigns to each s∈Ss\in Ss∈S the number q{f−1(s)}q\{f^{-1}(s)\}q{f−1(s)}, and a correlated equilibrium distribution (c.e.d.) is the distribution of some correlated equilibrium.

An information system consists of a finite set Ω\OmegaΩ of states of the world, a common prior ppp on Ω\OmegaΩ, an information partition Pi\mathcal P^iPi of Ω\OmegaΩ for each player, and action functions si:Ω→Si\mathbf s^i:\Omega\to S^isi:Ω→Si with s=(s1,…,sn)\mathbf s=(\mathbf s^1,\dots,\mathbf s^n)s=(s1,…,sn), each si\mathbf s^isi constant on the elements of Pi\mathcal P^iPi (each player knows his own action). For a random variable xxx, E(x∣Pi)(ω)E(x\mid\mathcal P^i)(\omega)E(x∣Pi)(ω) is the ppp-average of xxx over the element of Pi\mathcal P^iPi containing ω\omegaω. Player iii is Bayes rational at ω\omegaω if

E(hi(s)∣Pi)(ω) ≥ E(hi(s−i,a)∣Pi)(ω)for every a∈Si.E\big(h^i(\mathbf s)\mid\mathcal P^i\big)(\omega)\ \ge\ E\big(h^i(\mathbf s^{-i},a)\mid\mathcal P^i\big)(\omega)\quad\text{for every }a\in S^i .E(hi(s)∣Pi)(ω) ≥ E(hi(s−i,a)∣Pi)(ω)for every a∈Si.

Formalization targets

Goal: Main Theorem with its converse

Q is a c.e.d. of G  ⟺  ∃ information system (Ω,p,(Pi),s): every player is Bayes rational at every state, and Q(a)=p{s=a} ∀a.Q\ \text{is a c.e.d. of }G\iff\exists\ \text{information system }(\Omega,p,(\mathcal P^i),\mathbf s):\ \text{every player is Bayes rational at every state, and } Q(a)=p\{\mathbf s=a\}\ \forall a.Q is a c.e.d. of G⟺∃ information system (Ω,p,(Pi),s): every player is Bayes rational at every state, and Q(a)=p{s=a} ∀a.

This is the two-sided statement the paper announces in its introduction (p. 2) and closes in Sect. 4d (p. 11): "under Bayesian rationality, the set of all information systems corresponds precisely to the set of all correlated equilibria."

Milestones

  1. Main Theorem, proof: summing the cell-wise inequalities over the partition, Ehi(s−i,gi)≤Ehi(s)Eh^i(\mathbf s^{-i},g^i)\le Eh^i(\mathbf s)Ehi(s−i,gi)≤Ehi(s) for gig^igi constant on the cells of Pi\mathcal P^iPi.
  2. Main Theorem, proof: s\mathbf ss itself is a correlated equilibrium on (Ω,p)(\Omega,p)(Ω,p).
  3. Main Theorem (p. 7): the distribution of s\mathbf ss is a c.e.d.
  4. Sect. 4d: in the system generated by fff (partitions generated by fif^ifi), Bayes rationality everywhere is equivalent to (2.2).
  5. Sect. 4d: every correlated equilibrium is realized by a Bayes-rational information system with the same distribution.

The mission also states, as a supporting lemma without a milestone, the cell-wise step of the proof of the Main Theorem: Bayes rationality at every state gives E(hi(s−i,gi)∣P)≤E(hi(s)∣P)E(h^i(\mathbf s^{-i},g^i)\mid P)\le E(h^i(\mathbf s)\mid P)E(hi(s−i,gi)∣P)≤E(hi(s)∣P) on every cell PPP for gig^igi constant on cells.

Significance

The theorem identifies correlated equilibrium as the outcome of individual Bayesian decision making under a common prior, without any assumption that players randomize or that their choices are independent. It shows that the Nash equilibrium's independence requirement is not implied by rationality alone, and it is the template for later epistemic characterizations of solution concepts. On the computational side, correlated equilibrium distributions form a polytope described by linear inequalities (the companion mission of this series), which is why they are the tractable equilibrium notion in algorithmic game theory.

The result is proved in the paper; it has no machine-checked formalization known to this mission. Formalizing it pins down the exact role of the standing assumptions — finiteness, a common prior, measurability of each player's action with respect to his own partition, rationality at every state — and of the conditional expectation on cells of probability zero. The definitions (information systems, Bayes rationality, correlated equilibria as functions on a finite probability space) are reusable for later formalizations of the paper's Sect. 5 (subjective correlated equilibrium) and of other epistemic results.

Difficulty

The mathematics is short; the difficulty lies in the bookkeeping that the paper's notation hides. The hypothesis is interim (a conditional inequality at each state), while Definition 2.1 is ex ante (an unconditional inequality). Passing between them requires the law of total expectation over a partition whose cells may have probability zero, where conditional expectations are undefined. Deviations in Definition 2.1 are functions of fif^ifi, not arbitrary maps, and must be shown constant on cells, which uses measurability of si\mathbf s^isi. A tempting first idea — that rationality against every fixed action already gives rationality against every deviation — fails without measurability: a player who does not know his own action could be rational at each state against constant deviations while a deviation φ∘si\varphi\circ\mathbf s^iφ∘si varies inside his cells. The converse direction needs an information system that satisfies every axiom of the goal's right-hand side, not just one that is Bayes rational.

Formalization scope

  • Players form a finite type ι with decidable equality; action sets S i are arbitrary types (the paper's finiteness of SiS^iSi is not used); payoffs are h : ι → (∀ i, S i) → ℝ.
  • Probability spaces are finite types with a real weight vector satisfying AGT.IsLottery (from the published definition agt_games). State spaces and the witnessing probability spaces of a c.e.d. range over Type; for finite sets this loses nothing.
  • Partitions are Setoids. The Common Prior Assumption is built into the information system, which has a single prior. Measurability of each action function is a field of the structure.
  • Conditional expectation on a cell is a ratio of finite sums; on a cell of probability zero Lean returns 000, so Bayes rationality at such states holds vacuously. The prior is not required to have full support. This matches the paper, whose argument multiplies each cell inequality by the cell's probability.
  • Deviations in Definition 2.1 are exactly the compositions φ∘fi\varphi\circ f^iφ∘fi; neither all maps nor only constant maps. A c.e.d. requires a genuine probability vector, ruling out the trivializing reading in which the zero weight function witnesses every QQQ.
  • Contributions welcome: proofs of the milestones, a general law-of-total-expectation lemma for finite partitions, and lemmas relating distr to sums over action profiles.

Selected references

  • R. J. Aumann, Correlated Equilibrium as an Expression of Bayesian Rationality, Econometrica 55 (1987), no. 1, 1–18. https://doi.org/10.2307/1911154
  • 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
  • D. P. Foster and R. V. Vohra, Calibrated Learning and Correlated Equilibrium, Games and Economic Behavior 21 (1997), 40–55. https://doi.org/10.1006/game.1997.0595
  • S. Hart and 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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Online Scheduling of a Single Machine to Minimize Total Weighted Completion Time: Delayed SWPT Has Competitive Ratio 2Research Paper

Motivation

A single machine must process nnn jobs that arrive over time. Job jjj is released at time rjr_jrj​, needs pjp_jpj​ units of uninterrupted processing, and has weight wj>0w_j > 0wj​>0; the goal is to minimize the total weighted completion time ∑jwjCj\sum_j w_j C_j∑j​wj​Cj​. Offline, with all release dates equal to zero, Smith's rule (sequence by nondecreasing pj/wjp_j/w_jpj​/wj​) is optimal (Smith 1956); with arbitrary release dates the problem 1 ∣ rj ∣ ∑wjCj1\,|\,r_j\,|\,\sum w_j C_j1∣rj​∣∑wj​Cj​ is strongly NP-hard (Lenstra, Rinnooy Kan and Brucker 1977).

In the online version the scheduler learns of job jjj only at time rjr_jrj​, and at each moment must either start a released job or keep the machine idle. Its quality is measured by its competitive ratio: the worst case, over all instances, of the ratio between the online schedule's cost and the offline optimum. Release-date scheduling is one of the basic test cases of online optimization.

Timeline:

  • 1996. Hoogeveen and Vestjens show that no online algorithm has competitive ratio below 2, even with equal weights, and give the 2-competitive algorithm Delayed SPT for equal weights.
  • 1997. Hall, Schulz, Shmoys and Wein give a (3+ε)(3+\varepsilon)(3+ε)-competitive algorithm for arbitrary weights, based on geometric intervals and linear programming.
  • 1998. Phillips, Stein and Wein give another 2-competitive algorithm for equal weights, which does not extend to arbitrary weights.
  • 2002. Goemans, Queyranne, Schulz, Skutella and Wang obtain a (1+2)(1+\sqrt2)(1+2​)-competitive deterministic algorithm from an LP relaxation.
  • 2004. Anderson and Potts show that Delayed SWPT has competitive ratio exactly 2 for arbitrary positive weights, matching the lower bound.

Setting

An instance has jobs j∈J={1,…,n}j \in J = \{1,\dots,n\}j∈J={1,…,n} with integer release dates rj≥0r_j \ge 0rj​≥0, integer processing times pj≥1p_j \ge 1pj​≥1 and real weights wj>0w_j > 0wj​>0. A schedule assigns each job an integer start time SjS_jSj​. It is feasible if Sj≥rjS_j \ge r_jSj​≥rj​ for every jjj and no two intervals [Sj,Sj+pj)[S_j, S_j + p_j)[Sj​,Sj​+pj​) overlap; idle time is allowed. Its cost is C(S)=∑jwj(Sj+pj)C(S) = \sum_j w_j (S_j + p_j)C(S)=∑j​wj​(Sj​+pj​).

Delayed SWPT runs over unit time slots [t,t+1)[t, t+1)[t,t+1). When the machine is available at time ttt, it looks at the jobs released by ttt and not yet started, and selects one with the smallest ratio pj/wjp_j/w_jpj​/wj​. Ties go to the smaller pjp_jpj​, then to the smaller index. If pj≤tp_j \le tpj​≤t, it starts jjj at ttt and the machine is busy until t+pjt + p_jt+pj​. Otherwise the machine stays idle and the rule is applied again at t+1t+1t+1. The resulting schedule is written π\piπ, or dswpt I in Lean. In particular no job starts before time pjp_jpj​.

The proof uses three auxiliary problems:

  • the doubled problem (2P), with data (2rj,2pj,wj)(2r_j, 2p_j, w_j)(2rj​,2pj​,wj​);
  • the extended problem (E), with release dates rj′=max⁡{pj,f(rj)}r'_j = \max\{p_j, f(r_j)\}rj′​=max{pj​,f(rj​)}, where f(t)f(t)f(t) is the first time at or after ttt at which π\piπ leaves the machine free;
  • one unit-length gap job gtg_tgt​ for each slot [t,t+1)[t,t+1)[t,t+1) in which Delayed SWPT idles although a job jjj is available. The gap job has release date f(rj)f(r_j)f(rj​) and weight wj/pjw_j/p_jwj​/pj​.

The schedule πE\pi_EπE​ of (E) runs the original jobs as in π\piπ and each gtg_tgt​ in [t,t+1)[t,t+1)[t,t+1).

Formalization targets

Goal: Theorem 8

min⁡{ρ  :  ∑jwjCj(π)≤ρ∑jwjCj(S) for every instance and every feasible schedule S}=2.\min\Bigl\{\rho \;:\; \sum_j w_j C_j(\pi) \le \rho \sum_j w_j C_j(S)\ \text{for every instance and every feasible schedule } S\Bigr\} = 2.min{ρ:j∑​wj​Cj​(π)≤ρj∑​wj​Cj​(S) for every instance and every feasible schedule S}=2.

Lean: IsLeast {ρ | ∀ n I S, IsFeasible I.r I.p S → cost I.w I.p (dswpt I) ≤ ρ * cost I.w I.p S} 2. Both halves are required: the upper bound 222 and the fact that no smaller constant is valid for this algorithm.

Milestones

  1. πj≥pj\pi_j \ge p_jπj​≥pj​ for every job (§2) and rj′≤max⁡{2rj,pj}r'_j \le \max\{2r_j, p_j\}rj′​≤max{2rj​,pj​} (§3.2).
  2. πE\pi_EπE​ is feasible for (E) (§3.2).
  3. Lemma 1. If π∗\pi^*π∗ and μ∗\mu^*μ∗ are optimal for (P) and (2P), then C(μ∗)=2 C(π∗)C(\mu^*) = 2\,C(\pi^*)C(μ∗)=2C(π∗).
  4. Lemma 2. πE\pi_EπE​ is optimal for (E).
  5. Lemma 3. If μ∗\mu^*μ∗ is optimal for (2P) and a feasible σE\sigma_EσE​ for (E) satisfies
∑j∈JwjCj(σE)+∑g∈GwgCg(σE)≤∑j∈JwjCj(μ∗)+∑g∈GwgCg(πE),(1)\sum_{j\in J} w_j C_j(\sigma_E) + \sum_{g\in G} w_g C_g(\sigma_E) \le \sum_{j\in J} w_j C_j(\mu^*) + \sum_{g\in G} w_g C_g(\pi_E), \tag{1}j∈J∑​wj​Cj​(σE​)+g∈G∑​wg​Cg​(σE​)≤j∈J∑​wj​Cj​(μ∗)+g∈G∑​wg​Cg​(πE​),(1)

then C(π)≤2 C(S)C(\pi) \le 2\,C(S)C(π)≤2C(S) for every feasible SSS. 6. Inequality (1) holds for some feasible σE\sigma_EσE​, for every optimal μ∗\mu^*μ∗ of (2P) (§§3.4–3.6).

Significance

The theorem shows that a deterministic online algorithm can match the lower bound of Hoogeveen and Vestjens for arbitrary positive weights. This settles the best competitive ratio for deterministic online algorithms for 1 ∣ rj ∣ ∑wjCj1\,|\,r_j\,|\,\sum w_j C_j1∣rj​∣∑wj​Cj​. The algorithm needs no linear program. The analysis also does not compare the algorithm with a lower bound on the optimum. Instead it shows that the online schedule is optimal for a modified problem (E), and it converts an optimal schedule of (2P) into a schedule of (E).

The result was proved on paper in 2004. Neither Mathlib nor the Prove2Me catalog contains a machine-checked proof of it, or of any competitive ratio for online scheduling with release dates. This mission provides several reusable pieces:

  • an executable, verified-terminating definition of an online scheduling rule;
  • the doubling lemma for release-date problems;
  • the optimality criterion behind Lemma 2;
  • the block-by-block exchange argument of §§3.3–3.6.

Difficulty

The obvious argument fails at Lemma 2. Delayed SWPT is far from optimal for (P) itself, and its idle time is unbounded in relative terms. The proof therefore has to show that the inserted gap jobs make every idle slot "justified", so that a preemptive best-available argument becomes valid for (E). That argument rests on an optimality criterion of Belouadah, Posner and Potts (1992), which is not in Mathlib.

The second difficulty is inequality (1). Once μ∗\mu^*μ∗ is doubled and the gap jobs are inserted, nongap jobs must be shifted, and the gain of each gap-generating job must be charged against the delay of the gap jobs in its block. That accounting (Lemmas 4–7 of the paper) is an induction over blocks with signed differences of completion times.

The natural first idea, plain online SWPT (start the available job with the smallest pj/wjp_j/w_jpj​/wj​ whenever the machine is free), has no finite competitive ratio (Example 1 of the paper), so the delay πj≥pj\pi_j \ge p_jπj​≥pj​ is essential to the bound and must be tracked through the whole argument.

Formalization scope

Conventions committed to in Lean:

  • Data. Jobs are Fin n (0-based, so "smallest index" is the order of Fin n). Times are natural numbers, the paper's standing integer-data assumption (p. 688), and weights are real. Every instance carries pj≥1p_j \ge 1pj​≥1 and wj>0w_j > 0wj​>0.
  • Schedules and optimality. Schedules are integer start times. Feasibility, cost and optimality are defined for any finite job type, so (E), with job type Fin n ⊕ gapTimes I, uses the same notions. "Optimal" means optimal among all feasible nonpreemptive schedules with integer start times.
  • The algorithm. Delayed SWPT is a def: a unit-time simulation that compares ratios by cross-multiplication and re-applies the rule at every slot. It runs to the horizon ∑j(rj+2pj)+1\sum_j (r_j + 2p_j) + 1∑j​(rj​+2pj​)+1. A sorry-free check (not uploaded) shows that every job has started by then, and that the simulation reproduces Examples 3 and 4 of the paper, including the gap times 0,2,3,4,5,60,2,3,4,5,60,2,3,4,5,6 of Table 2.
  • Completion times. In (2P) the completion time is μj∗+2pj\mu^*_j + 2p_jμj∗​+2pj​, and gap jobs have unit length.

The goal quantifies over every feasible schedule of every instance. It cannot be met by restricting the competitor to schedules without idle time or to list schedules, by dropping release-date feasibility, or by leaving jobs unscheduled.

Out of scope:

  • The general lower bound "no online algorithm beats 2" (Example 2 of the paper, due to Hoogeveen and Vestjens) is not part of the mission. The lower half of the goal concerns Delayed SWPT only.
  • The Belouadah–Posner–Potts optimality criterion is an external ingredient of Lemma 2. Solvers may formalize it as a supporting theorem.

Infrastructure that a complete development needs:

  • simulation invariants for the algorithm;
  • exchange and left-shift arguments for single-machine schedules;
  • the job-splitting relaxation behind the best-available criterion.

The schedule vocabulary and the criterion are reusable for other release-date scheduling results. Contributions toward the block lemmas of §§3.3–3.6 (Lemmas 4–7, the bound (9)) are welcome as supporting theorems.

Selected references

  • E. J. Anderson and C. N. Potts, Online Scheduling of a Single Machine to Minimize Total Weighted Completion Time, Mathematics of Operations Research 29(3), 686–697, 2004. https://doi.org/10.1287/moor.1040.0092
  • J. A. Hoogeveen and A. P. A. Vestjens, Optimal On-Line Algorithms for Single-Machine Scheduling, IPCO 1996, LNCS 1084, 404–414. https://doi.org/10.1007/3-540-61310-2_30
  • L. A. Hall, A. S. Schulz, D. B. Shmoys and J. Wein, Scheduling to Minimize Average Completion Time: Off-line and On-line Approximation Algorithms, Mathematics of Operations Research 22(3), 513–544, 1997. https://doi.org/10.1287/moor.22.3.513
  • C. Phillips, C. Stein and J. Wein, Minimizing Average Completion Time in the Presence of Release Dates, Mathematical Programming 82, 199–223, 1998. https://doi.org/10.1007/BF01585872
  • M. X. Goemans, M. Queyranne, A. S. Schulz, M. Skutella and Y. Wang, Single Machine Scheduling with Release Dates, SIAM Journal on Discrete Mathematics 15(2), 165–192, 2002. https://doi.org/10.1137/S089548019936223X
  • H. Belouadah, M. E. Posner and C. N. Potts, Scheduling with Release Dates on a Single Machine to Minimize Total Weighted Completion Time, Discrete Applied Mathematics 36(3), 213–231, 1992. https://doi.org/10.1016/0166-218X(92)90255-9
  • J. K. Lenstra, A. H. G. Rinnooy Kan and P. Brucker, Complexity of Machine Scheduling Problems, Annals of Discrete Mathematics 1, 343–362, 1977. https://doi.org/10.1016/S0167-5060(08)70743-X
  • W. E. Smith, Various Optimizers for Single-Stage Production, Naval Research Logistics Quarterly 3, 59–66, 1956. https://doi.org/10.1002/nav.3800030106
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Correlated Equilibrium as an Expression of Bayesian Rationality II: Two-Person Correlated Equilibrium Distributions Are the Solutions of Linear InequalitiesResearch Paper

Motivation

A correlated equilibrium is the equilibrium notion that arises when the players of a game take their actions on the advice of a common randomizing device, each player seeing only his own recommendation. It was introduced by Aumann in 1974 (Aumann 1974). Aumann's 1987 paper (Aumann 1987) gives the simple, finite form of the definition used today (Definition 2.1) and shows that the notion is what Bayesian rationality with a common prior predicts. On the way it records, as Proposition 2.3, the fact that makes correlated equilibrium tractable in practice: for a finite two-person game, the distributions over action pairs that come from correlated equilibria are exactly the solutions of an explicit finite system of linear inequalities.

That characterization is the starting point of the computational theory of correlated equilibria. Because the set is a polyhedron, an optimal correlated equilibrium can be found by linear programming, and no-swap-regret learning dynamics converge to this set (Foster and Vohra 1997; Hart and Mas-Colell 2000). In each of these works the linear-inequality description is taken as the definition; the paper's Proposition 2.3 is the bridge back to the strategic definition.

Setting

Player 1 has a finite set S1S^1S1 of actions and player 2 a finite set S2S^2S2. For j∈S1j \in S^1j∈S1 and k∈S2k \in S^2k∈S2, hjk1h^1_{jk}hjk1​ and hjk2h^2_{jk}hjk2​ are the two players' payoffs at the action pair (j,k)(j,k)(j,k).

A correlated strategy pair is a pair of functions f1:Γ→S1f^1 : \Gamma \to S^1f1:Γ→S1, f2:Γ→S2f^2 : \Gamma \to S^2f2:Γ→S2 on a finite probability space (Γ,μ)(\Gamma, \mu)(Γ,μ): a finite set Γ\GammaΓ with nonnegative weights μ(γ)\mu(\gamma)μ(γ) summing to 111. Chance draws γ\gammaγ and suggests the action fi(γ)f^i(\gamma)fi(γ) to player iii. The pair is a correlated equilibrium (Definition 2.1, condition (2.2)) if no player gains by a deviation that depends only on his own suggestion: for every φ:S1→S1\varphi : S^1 \to S^1φ:S1→S1,

E h1(φ(f1),f2)≤E h1(f1,f2),\mathbb E\, h^1(\varphi(f^1), f^2) \le \mathbb E\, h^1(f^1, f^2),Eh1(φ(f1),f2)≤Eh1(f1,f2),

and the analogous inequality holds for player 2 and every ψ:S2→S2\psi : S^2 \to S^2ψ:S2→S2.

A distribution is a family (pjk)j∈S1,k∈S2(p_{jk})_{j \in S^1, k \in S^2}(pjk​)j∈S1,k∈S2​ with pjk≥0p_{jk} \ge 0pjk​≥0 and ∑j∑kpjk=1\sum_j \sum_k p_{jk} = 1∑j​∑k​pjk​=1. The distribution of a correlated strategy pair assigns to (j,k)(j,k)(j,k) the probability μ{f1=j, f2=k}\mu\{f^1 = j,\ f^2 = k\}μ{f1=j, f2=k}. A correlated equilibrium distribution (c.e.d.) is the distribution of some correlated equilibrium on some finite probability space.

In the Lean development these are IsDistribution p, IsProbVec μ, IsCE h₁ h₂ μ f₁ f₂, distr μ f₁ f₂ and IsCED h₁ h₂ p, with h₁ j k =hjk1= h^1_{jk}=hjk1​ and p j k =pjk= p_{jk}=pjk​.

Formalization targets

Goal: Proposition 2.3

For every distribution (pjk)(p_{jk})(pjk​): (pjk)(p_{jk})(pjk​) is a correlated equilibrium distribution if and only if

∑k(hjk1−hqk1) pjk≥0for all j,q∈S1,(2.4)\sum_k \big(h^1_{jk} - h^1_{qk}\big)\, p_{jk} \ge 0 \quad \text{for all } j, q \in S^1, \tag{2.4}k∑​(hjk1​−hqk1​)pjk​≥0for all j,q∈S1,(2.4) ∑j(hjk2−hjr2) pjk≥0for all k,r∈S2.(2.5)\sum_j \big(h^2_{jk} - h^2_{jr}\big)\, p_{jk} \ge 0 \quad \text{for all } k, r \in S^2. \tag{2.5}j∑​(hjk2​−hjr2​)pjk​≥0for all k,r∈S2.(2.5)

Milestones

  1. Identification with distributions (Sect. 2, p. 4). A correlated strategy pair is a correlated equilibrium if and only if its distribution ppp satisfies ∑j∑kpjkhφ(j)k1≤∑j∑kpjkhjk1\sum_j\sum_k p_{jk} h^1_{\varphi(j)k} \le \sum_j\sum_k p_{jk} h^1_{jk}∑j​∑k​pjk​hφ(j)k1​≤∑j​∑k​pjk​hjk1​ for all φ\varphiφ, and the analogous condition for player 2.
  2. Conditioning on possible suggestions (proof of Prop. 2.3, p. 6). For a distribution, player 1's condition holds if and only if H1(q∣j)≤H1(j∣j)H^1(q \mid j) \le H^1(j \mid j)H1(q∣j)≤H1(j∣j) for every suggestion jjj of positive probability and every qqq, where H1(q∣j)=∑khqk1pjk/∑kpjkH^1(q\mid j) = \sum_k h^1_{qk} p_{jk} / \sum_k p_{jk}H1(q∣j)=∑k​hqk1​pjk​/∑k​pjk​; likewise for player 2.
  3. Player 1 gives (2.4): player 1's condition on ppp is equivalent to (2.4).
  4. Player 2 gives (2.5): player 2's condition on ppp is equivalent to (2.5).

A further statement, not a milestone, records the paper's example on p. 5: in the game of chicken (Figure 4) the distribution of Figure 5 is a c.e.d. with expected payoff (5,5)(5,5)(5,5).

Significance

The result. Proposition 2.3 turns an existential statement — there is some probability space and some correlated strategy pair that is an equilibrium and has distribution ppp — into finitely many linear inequalities on ppp alone. Consequently the set of c.e.d.'s is a compact convex polyhedron, membership is decidable by evaluating ∣S1∣2+∣S2∣2|S^1|^2 + |S^2|^2∣S1∣2+∣S2∣2 linear forms, and optimizing a linear objective over it is a linear program. The paper states the two-person case and remarks that "the principle, however, is no different in the general case".

Formalizing it. The proposition is classical and its proof is short; to our knowledge it has no machine-checked proof. The platform already has the linear-inequality (swap) form of correlated equilibrium for two-player games on Fin m × Fin n (Foster–Vohra 1997 missions) and Aumann's 1974 randomizing-structure model, but no statement that connects the strategic definition over arbitrary finite probability spaces with the linear system. This mission supplies that connection, so that results proved about the polyhedron apply to equilibria in Aumann's sense and conversely.

Difficulty

The mathematics is elementary; the care is in the statement. Two points need attention. First, the direction from the inequalities to a c.e.d. requires constructing a probability space and a correlated strategy pair whose distribution is the given ppp; the c.e.d. notion quantifies over probability spaces, not over distributions. Second, the paper's argument divides by the probability ∑kpjk\sum_k p_{jk}∑k​pjk​ of a suggestion, which may be zero; the conditional formulation (milestone 2) holds only over possible suggestions, while (2.4) and (2.5) quantify over all actions and hold trivially at impossible ones. Deviations must be functions of the player's own suggestion: restricting to constant deviations gives coarse correlated equilibrium, which (2.4)–(2.5) do not characterize, and allowing arbitrary functions of γ\gammaγ gives a stronger notion.

Formalization scope

Two players with finite action types S₁ S₂ : Type* (Fintype, DecidableEq); payoffs h₁ h₂ : S₁ → S₂ → ℝ; distributions p : S₁ → S₂ → ℝ with the sign and sum conditions as an explicit hypothesis of every statement about distributions. Finite probability spaces are finite types Γ : Type with a probability vector μ : Γ → ℝ; deviations are compositions φ ∘ f₁ with φ : S₁ → S₁. The conditional payoffs H1H^1H1, H2H^2H2 use Lean's x / 0 = 0 and are only ever used at possible suggestions. Empty action sets admit no distribution, so the statements are then vacuous, exactly as in the paper.

A trivializing formalization is ruled out: "c.e.d." is the existential notion over finite probability spaces with a genuine probability vector and an equilibrium in the sense of Definition 2.1, not the inequalities themselves or the swap form on ppp.

No infrastructure beyond finite sums and Finset.filter is needed. Contributions welcome: proofs of the milestones, and the nnn-player generalization the paper alludes to.

Selected references

  • R. J. Aumann, Correlated Equilibrium as an Expression of Bayesian Rationality, Econometrica 55 (1987), 1–18. https://doi.org/10.2307/1911154
  • 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
  • D. P. Foster and R. V. Vohra, Calibrated Learning and Correlated Equilibrium, Games and Economic Behavior 21 (1997), 40–55. https://doi.org/10.1006/game.1997.0595
  • S. Hart and 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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Operations ResearchProbabilityTheoretical Computer Science·Captain: mikedeng1

Secretary Problems: Weights and Discounts 2: An Ω(log n / log log n) Lower Bound on the Competitive Ratio of the Discounted Secretary ProblemResearch Paper

Motivation

In the classical secretary problem a decision maker sees nnn candidates in uniformly random order, learns each candidate's value on arrival, and must accept or reject it on the spot; the goal is to pick a valuable one. A simple sample-then-select rule picks the best candidate with probability at least 1/e1/e1/e, so the problem is constant-competitive. The secretary problem is also a model of online mechanism design: a rule that accepts the first agent above a threshold computed from earlier agents is a truthful posted-price mechanism (as the paper notes in §1).

Babaioff, Dinitz, Gupta, Immorlica and Talwar (SODA 2009; authors' version) study the discounted secretary problem, where accepting at time ttt is worth d(t) v(e)d(t)\,v(e)d(t)v(e) for a known discount function ddd. Discounts model settings where a sale is worth more at some times than at others. The case d(t)=βtd(t)=\beta^td(t)=βt had been studied before (Rasmussen and Pliska 1976); the paper asks what happens for arbitrary ddd. Its answer has two sides: an O(log⁡n)O(\log n)O(logn)-competitive algorithm, and the result of this mission, a lower bound showing that no online algorithm is better than Ω(log⁡n/log⁡log⁡n)\Omega(\log n/\log\log n)Ω(logn/loglogn)-competitive. So, unlike the classical problem, the discounted problem with a general discount is not constant-competitive.

Setting

There are nnn elements e∈{0,…,n−1}e\in\{0,\dots,n-1\}e∈{0,…,n−1} with values v(e)≥0v(e)\ge 0v(e)≥0, and a discount function ddd on the times. The elements arrive in a uniformly random order π\piπ: element π(t)\pi(t)π(t) arrives at time ttt. A randomized online stopping rule AAA specifies, for each time ttt and each sequence of values seen so far h=(v(π(0)),…,v(π(t)))h=(v(\pi(0)),\dots,v(\pi(t)))h=(v(π(0)),…,v(π(t))), a probability pt(h)∈[0,1]p_t(h)\in[0,1]pt​(h)∈[0,1] of stopping at ttt if it has not stopped yet. Stopping at ttt selects π(t)\pi(t)π(t) and earns d(t) v(π(t))d(t)\,v(\pi(t))d(t)v(π(t)); the rule selects at most one element and may select none. The rule knows nnn and ddd, but it sees only values, only as they arrive, and it is not told which instance it is facing.

The expected value of AAA is

E[A]=Eπ[∑td(t) v(π(t)) pt(ht)∏s<t(1−ps(hs))],\mathbb E[A]=\mathbb E_\pi\Bigl[\sum_t d(t)\,v(\pi(t))\,p_t(h_t)\prod_{s<t}\bigl(1-p_s(h_s)\bigr)\Bigr],E[A]=Eπ​[t∑​d(t)v(π(t))pt​(ht​)s<t∏​(1−ps​(hs​))],

and the benchmark is the expected offline optimum

E[OPT]=Eπ[max⁡td(t) v(π(t))],\mathbb E[\mathrm{OPT}]=\mathbb E_\pi\Bigl[\max_t d(t)\,v(\pi(t))\Bigr],E[OPT]=Eπ​[tmax​d(t)v(π(t))],

which is itself a random variable averaged over the order. AAA is α\alphaα-competitive on an instance when E[OPT]≤α E[A]\mathbb E[\mathrm{OPT}]\le\alpha\,\mathbb E[A]E[OPT]≤αE[A].

The hard family (§4.1.1 of the paper): fix an integer c≥1c\ge1c≥1 and put L=cL=cL=c, n=L4cn=L^{4c}n=L4c, nt=L2tn_t=L^{2t}nt​=L2t for t≤2ct\le 2ct≤2c, and K=n2K=n^2K=n2. The step discount is d(j)=L−1d(j)=L^{-1}d(j)=L−1 on the times 1≤j≤n11\le j\le n_11≤j≤n1​ and d(j)=L−td(j)=L^{-t}d(j)=L−t on nt−1<j≤ntn_{t-1}<j\le n_tnt−1​<j≤nt​. The instance I1\mathcal I_1I1​ has n/n1n/n_1n/n1​ elements of value KKK and the rest 000; It+1\mathcal I_{t+1}It+1​ is obtained from It\mathcal I_tIt​ by raising n/nt+1n/n_{t+1}n/nt+1​ of its values KtK^tKt to Kt+1K^{t+1}Kt+1, so It\mathcal I_tIt​ has n/ntn/n_tn/nt​ elements of value KtK^tKt.

Formalization targets

Goal: Theorem 4.3 in the form its proof establishes

For every integer c≥1c\ge1c≥1 and every randomized online stopping rule AAA for horizon n=c4cn=c^{4c}n=c4c and the step discount,

∃ t∈{1,…,2c}:c⋅E[A(It)] < 10⋅E[OPT(It)].\exists\,t\in\{1,\dots,2c\}:\qquad c\cdot\mathbb E[A(\mathcal I_t)]\ <\ 10\cdot\mathbb E[\mathrm{OPT}(\mathcal I_t)].∃t∈{1,…,2c}:c⋅E[A(It​)] < 10⋅E[OPT(It​)].

That is, no online rule is c/10c/10c/10-competitive on all of I1,…,I2c\mathcal I_1,\dots,\mathcal I_{2c}I1​,…,I2c​.

Milestones

  1. Lemma 4.1: E[OPT(It)]≥(1−1/e)KtL−t\mathbb E[\mathrm{OPT}(\mathcal I_t)]\ge(1-1/e)K^tL^{-t}E[OPT(It​)]≥(1−1/e)KtL−t for 1≤t≤2c1\le t\le 2c1≤t≤2c.
  2. Coupling step of Lemma 4.2's proof: for every rule and 1≤t<2c1\le t<2c1≤t<2c, the probability of stopping among the first ntn_tnt​ arrivals drops by at most 1/L21/L^21/L2 from It\mathcal I_tIt​ to It+1\mathcal I_{t+1}It+1​.
  3. Lemma 4.2: a rule that is c/10c/10c/10-competitive on I1,…,I2c\mathcal I_1,\dots,\mathcal I_{2c}I1​,…,I2c​ stops among the first ntn_tnt​ arrivals of It\mathcal I_tIt​ with probability at least t/ct/ct/c.
  4. Theorem 4.3, asymptotic form: for c≥2c\ge2c≥2 and n=c4cn=c^{4c}n=c4c, every rule has some It\mathcal I_tIt​ with
140⋅log⁡nlog⁡log⁡n⋅E[A(It)]<E[OPT(It)].\frac1{40}\cdot\frac{\log n}{\log\log n}\cdot\mathbb E[A(\mathcal I_t)]<\mathbb E[\mathrm{OPT}(\mathcal I_t)].401​⋅loglognlogn​⋅E[A(It​)]<E[OPT(It​)].

Significance

The result separates the discounted secretary problem from its classical and weighted relatives, which admit constant-competitive algorithms (the paper's Theorem 3.4 and the eee-competitive classical rule). Together with the paper's O(log⁡n)O(\log n)O(logn) upper bound (Theorem 4.4) it pins the competitive ratio for general discounts between log⁡n/log⁡log⁡n\log n/\log\log nlogn/loglogn and log⁡n\log nlogn up to constants, and it motivates the paper's known-OPT\mathrm{OPT}OPT model (§4.2), where an estimate of E[OPT]\mathbb E[\mathrm{OPT}]E[OPT] restores a constant ratio. The construction is a template for lower bounds against randomized online algorithms in random-order models: geometrically nested instances that a rule cannot tell apart early, played against a discount that punishes waiting.

The theorem is proved in the paper, in about a page. To our knowledge no part of it has a machine-checked proof. This mission produces the formal model of randomized online stopping rules in the random-order discounted setting, a reusable object for the paper's other discounted results (the O(log⁡n)O(\log n)O(logn) upper bound, and the 2\sqrt22​ lower bound with known values of Theorem 4.6), and a checked version of the lower bound with explicit constants.

Difficulty

The obvious attempt is to fix one instance and show that every rule loses on it. That fails: for any single instance there is a rule tuned to it (a rule that waits exactly as long as that instance warrants). The lower bound has to play the 2c2c2c instances against each other. A rule that does well on It\mathcal I_tIt​ must commit early, within the first ntn_tnt​ steps, yet the rule cannot distinguish It\mathcal I_tIt​ from It+1\mathcal I_{t+1}It+1​ during those steps except with probability L−2L^{-2}L−2. Making "cannot distinguish" precise is the central step: it needs a coupling of the two runs over the same random order and the same internal randomness, which works only because the rule's decision at time ttt depends on the values observed so far and nothing else. The accounting then has to show that the rule's early earnings on It+1\mathcal I_{t+1}It+1​ and its late earnings are both small compared with E[OPT(It+1)]\mathbb E[\mathrm{OPT}(\mathcal I_{t+1})]E[OPT(It+1​)], which uses L≥2L\ge 2L≥2 and that K=n2K=n^2K=n2 dwarfs L2cL^{2c}L2c.

Formalization scope

  • Elements and times are Fin n, 0-based: index jjj is the paper's time j+1j+1j+1, so the paper's block (nt−1,nt](n_{t-1},n_t](nt−1​,nt​] is the index range [nt−1,nt)[n_{t-1},n_t)[nt−1​,nt​). The random order is π : Equiv.Perm (Fin n) read as time ↦\mapsto↦ element, and every expectation over it is the finite average 1n!∑π\frac1{n!}\sum_\pin!1​∑π​. Values and discounts are real.
  • Algorithms are the structure StoppingRule n: stopping probabilities pt(h)∈[0,1]p_t(h)\in[0,1]pt​(h)∈[0,1] indexed by time and the arrival-ordered value sequence, with the non-anticipation condition that pt(h)p_t(h)pt​(h) depends only on h0,…,hth_0,\dots,h_th0​,…,ht​. The theorem quantifies over all such rules, so it covers deterministic and randomized online algorithms that observe values only. A rule may depend on nnn and ddd but not on the instance index.
  • OPT is Eπ[max⁡td(t)v(π(t))]\mathbb E_\pi[\max_t d(t)v(\pi(t))]Eπ​[maxt​d(t)v(π(t))] (a supremum over the finite type Fin n), and competitiveness is multiplicative, E[OPT]≤α E[A]\mathbb E[\mathrm{OPT}]\le\alpha\,\mathbb E[A]E[OPT]≤αE[A], never a quotient.
  • Constants. The goal uses the paper's constant 101010 (from "if AAA is c/10c/10c/10-competitive"); the asymptotic form uses 1/401/401/40, from log⁡n/log⁡log⁡n≤4c\log n/\log\log n\le 4clogn/loglogn≤4c for c≥2c\ge2c≥2, with the natural logarithm. K=n2K=n^2K=n2, the value the paper suggests.
  • The construction (nnn, ntn_tnt​, ddd, KKK, It\mathcal I_tIt​) is fixed by explicit formulas in the definition file. A solver cannot choose the discount or the instances, and the goal is not stated for a restricted class of algorithms; a formalization that let the rule see the instance index or future values, or quantified only over threshold rules, would be a different and trivial or weaker theorem. For c<10c<10c<10 the goal is immediate, since E[A]≤E[OPT]\mathbb E[A]\le\mathbb E[\mathrm{OPT}]E[A]≤E[OPT] and E[OPT(It)]>0\mathbb E[\mathrm{OPT}(\mathcal I_t)]>0E[OPT(It​)]>0; the content lies in c≥10c\ge10c≥10. The bound is stated only for the horizons n=c4cn=c^{4c}n=c4c the paper constructs.
  • Needed infrastructure: counting arguments over permutations of Fin n (the probability that a set of mmm elements misses the first kkk positions), the coupling of two value sequences that agree on a prefix, and elementary estimates on geometric sums. The rule model and the permutation-counting lemmas are reusable for the paper's other discounted results. Contributions of these supporting lemmas, as well as proofs of the milestones, are welcome.

Selected references

  • M. Babaioff, M. Dinitz, A. Gupta, N. Immorlica, K. Talwar, Secretary Problems: Weights and Discounts, Proceedings of the 20th ACM-SIAM Symposium on Discrete Algorithms (SODA), 2009. https://doi.org/10.1137/1.9781611973068.135 (authors' full version, the one cited here: https://www.cs.jhu.edu/~mdinitz/papers/secretary.pdf)
  • E. B. Dynkin, Optimal choice of the stopping moment of a Markov process, Doklady Akademii Nauk SSSR, 1963.
  • W. T. Rasmussen, S. R. Pliska, Choosing the maximum from a sequence with a discount function, Applied Mathematics and Optimization 2(3), 1976.
  • T. S. Ferguson, Who solved the secretary problem?, Statistical Science 4(3), 1989. https://doi.org/10.1214/ss/1177012493
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Operations ResearchProbabilityTheoretical Computer Science·Captain: mikedeng1

Secretary Problems: Weights and Discounts 4: A Threshold Rule Earns Z/4 for Any Z ≤ E[OPT] in the Discounted Secretary ProblemResearch Paper

Motivation

In the classical secretary problem a decision maker sees nnn candidates in a uniformly random order and must accept or reject each one on arrival, irrevocably, aiming to accept a valuable one. Its online, random-order structure models hiring, selling an item to sequentially arriving buyers, and posting prices in online markets. Babaioff, Dinitz, Gupta, Immorlica and Talwar (SODA 2009) study the discounted secretary problem, where the reward of a selection depends on when it is made: a candidate accepted late is worth less (or more) by a time-dependent factor, as with a seller whose revenue decays with time, or a firm that loses value the longer a position stays empty.

Timeline of the setting:

  • Dynkin (1963) introduced the classical problem; the rule "observe a 1/e1/e1/e fraction, then accept the first record" selects the best candidate with probability tending to 1/e1/e1/e.
  • Rasmussen and Pliska (1975/76) and Mahdian, McAfee and Pennock (2008, personal communication cited by the paper) studied secretary problems with specific "well-behaved" discount functions such as d(t)=βtd(t)=\beta^td(t)=βt.
  • Babaioff et al. (2009) treat an arbitrary discount function ddd. Without prior knowledge, no algorithm is better than Ω(log⁡n/log⁡log⁡n)\Omega(\log n/\log\log n)Ω(logn/loglogn)-competitive (their Theorem 4.3), and O(log⁡n)O(\log n)O(logn) is achievable (Theorem 4.4). If the algorithm knows a good estimate ZZZ of the expected offline optimum, a single threshold rule recovers a constant fraction (Theorem 4.7, headlined as Theorem 1.2). This mission formalizes that last result.

Setting

There are n≥1n\ge1n≥1 elements, indexed by Fin n\mathrm{Fin}\,nFinn. Element eee has a value v(e)≥0v(e)\ge0v(e)≥0, and each time t∈{1,…,n}t\in\{1,\dots,n\}t∈{1,…,n} has a discount d(t)≥0d(t)\ge0d(t)≥0. The elements arrive in a uniformly random order π\piπ, a bijection from times to elements: element π(t)\pi(t)π(t) arrives at time ttt. Selecting the element that arrives at time iii earns d(i) v(π(i))d(i)\,v(\pi(i))d(i)v(π(i)), and an algorithm selects at most one element.

The offline optimum on the order π\piπ is OPT(π)=max⁡i=1nd(i) v(π(i))\mathrm{OPT}(\pi)=\max_{i=1}^n d(i)\,v(\pi(i))OPT(π)=maxi=1n​d(i)v(π(i)). It is a random variable, and the benchmark is its expectation

E[OPT]=∑π∈Sn1n!max⁡i=1n{d(i) v(π(i))}.\mathbf E[\mathrm{OPT}]=\sum_{\pi\in S_n}\frac1{n!}\max_{i=1}^n\{d(i)\,v(\pi(i))\}.E[OPT]=π∈Sn​∑​n!1​i=1maxn​{d(i)v(π(i))}.

For a real parameter ZZZ, algorithm A\mathcal AA selects the first time jjj at which d(j) v(π(j))≥Z/2d(j)\,v(\pi(j))\ge Z/2d(j)v(π(j))≥Z/2 and earns that product; if no time qualifies, it selects nothing and earns 000. It knows ZZZ and ddd, sees the values one at a time, and never sees the future of π\piπ. Its expected value is E[A]=∑π∈Sn1n! A(π)\mathbf E[\mathcal A]=\sum_{\pi\in S_n}\frac1{n!}\,\mathcal A(\pi)E[A]=∑π∈Sn​​n!1​A(π).

The proof uses three derived objects:

  • the accepting permutations Sacc={π:max⁡id(i)v(π(i))≥Z/2}S_{acc}=\{\pi:\max_i d(i)v(\pi(i))\ge Z/2\}Sacc​={π:maxi​d(i)v(π(i))≥Z/2}, on which A\mathcal AA selects something;
  • their contribution L=∑π∈Sacc1n!max⁡id(i)v(π(i))L=\sum_{\pi\in S_{acc}}\frac1{n!}\max_i d(i)v(\pi(i))L=∑π∈Sacc​​n!1​maxi​d(i)v(π(i)) to E[OPT]\mathbf E[\mathrm{OPT}]E[OPT];
  • for a time iii and an element jjj, the set GijG_{ij}Gij​ of orders on which A\mathcal AA selects jjj at time iii. These are the orders with π(i)=j\pi(i)=jπ(i)=j and d(k)v(π(k))<Z/2d(k)v(\pi(k))<Z/2d(k)v(π(k))<Z/2 for every k<ik<ik<i.

Formalization targets

Goal: Theorem 4.7

For every n≥1n\ge1n≥1, all discounts d≥0d\ge0d≥0, all values v≥0v\ge0v≥0 and every real ZZZ,

Z≤E[OPT] ⟹ E[A] ≥ Z4.Z\le\mathbf E[\mathrm{OPT}]\ \Longrightarrow\ \mathbf E[\mathcal A]\ \ge\ \frac Z4.Z≤E[OPT] ⟹ E[A] ≥ 4Z​.

Taking Z=E[OPT]Z=\mathbf E[\mathrm{OPT}]Z=E[OPT] gives E[OPT]≤4 E[A]\mathbf E[\mathrm{OPT}]\le4\,\mathbf E[\mathcal A]E[OPT]≤4E[A], a 444-competitive algorithm when the expected optimum is known.

Milestones (in the order of the paper's proof, p. 8)

  1. Eq. (4.1). If Z≤E[OPT]Z\le\mathbf E[\mathrm{OPT}]Z≤E[OPT] then L≥Z/2L\ge Z/2L≥Z/2.
  2. Eq. (4.3). If Z≤E[OPT]Z\le\mathbf E[\mathrm{OPT}]Z≤E[OPT] then
∑i=1n∑j: d(i)v(j)≥Z/21n d(i)v(j) ≥ Z2.\sum_{i=1}^n\sum_{j:\,d(i)v(j)\ge Z/2}\frac1n\,d(i)v(j)\ \ge\ \frac Z2.i=1∑n​j:d(i)v(j)≥Z/2∑​n1​d(i)v(j) ≥ 2Z​.
  1. Eq. (4.4). E[A]=∑i=1n∑j: d(i)v(j)≥Z/2d(i)v(j) ∣Gij∣∣Sn∣\displaystyle\mathbf E[\mathcal A]=\sum_{i=1}^n\sum_{j:\,d(i)v(j)\ge Z/2}d(i)v(j)\,\frac{|G_{ij}|}{|S_n|}E[A]=i=1∑n​j:d(i)v(j)≥Z/2∑​d(i)v(j)∣Sn​∣∣Gij​∣​.
  2. Claim 4.8. For every i,ji,ji,j with d(i)v(j)≥Z/2d(i)v(j)\ge Z/2d(i)v(j)≥Z/2, n∣Gij∣≥∣Sn∖Sacc∣n|G_{ij}|\ge|S_n\setminus S_{acc}|n∣Gij​∣≥∣Sn​∖Sacc​∣; and if 2∣Sacc∣≤n!2|S_{acc}|\le n!2∣Sacc​∣≤n! then 2n∣Gij∣≥n!2n|G_{ij}|\ge n!2n∣Gij​∣≥n!.

Significance

The result. The discounted problem separates sharply by information: a logarithmic gap is unavoidable without prior knowledge, while knowledge of the single number E[OPT]\mathbf E[\mathrm{OPT}]E[OPT], or of any lower estimate ZZZ of it, closes the gap to a constant. The algorithm is a fixed posted threshold, so read as a mechanism it is a posted price, which is truthful for single-parameter agents (§1). The paper also notes that when all values are known, E[OPT]\mathbf E[\mathrm{OPT}]E[OPT] can be estimated by sampling (its Lemma A.1), which yields a constant-competitive algorithm in that setting. The companion lower bound (Theorem 4.6) shows that even complete knowledge of the values does not give a ratio better than 2\sqrt22​.

Formalizing it. The result is proved on paper; no machine-checked proof is known. The formalization yields a checked version of the paper's counting argument on permutations (Claim 4.8) and of the tie-breaking step behind Eq. (4.3), and reusable finite random-order bookkeeping: expectations over SnS_nSn​ as averages, threshold stopping rules, and the decomposition of an online algorithm's value by the time and element it selects.

Difficulty

The obvious argument fails when A\mathcal AA rarely selects. A\mathcal AA earns at least Z/2Z/2Z/2 whenever it selects anything, so E[A]≥Z2Pr⁡[A selects]\mathbf E[\mathcal A]\ge\frac Z2\Pr[\mathcal A\text{ selects}]E[A]≥2Z​Pr[A selects]. That settles the case Pr⁡[A selects]≥1/2\Pr[\mathcal A\text{ selects}]\ge1/2Pr[A selects]≥1/2 and nothing else: the probability of selecting can be tiny while E[OPT]\mathbf E[\mathrm{OPT}]E[OPT] is still large, because the optimum may be concentrated on a few orders with a large product. In that case the bound must come from comparing the algorithm with the optimum pair by pair: every time–element pair (i,j)(i,j)(i,j) with d(i)v(j)≥Z/2d(i)v(j)\ge Z/2d(i)v(j)≥Z/2 must be realized by A\mathcal AA on a positive fraction of the orders.

Two points need care in a formal proof:

  • Eq. (4.2) rewrites LLL as a sum over pairs weighted by the conditional probability that d(i)v(j)d(i)v(j)d(i)v(j) is the highest product. It relies on a consistent tie-breaking rule, which the paper leaves implicit.
  • Claim 4.8 is a counting argument on SnS_nSn​. A map from the rejecting orders into GijG_{ij}Gij​ swaps element jjj into position iii, and must be shown to be at most nnn-to-111 and to land in GijG_{ij}Gij​.

Neither (4.2) nor the map appears in the statements, so solvers may replace either with any argument they like.

Formalization scope

  • Types. Times and elements are Fin n; the paper's time ttt is the index t−1t-1t−1. An order is π : Equiv.Perm (Fin n), read as time ↦ element, as on p. 3. The instance [NeZero n] encodes n≥1n\ge1n≥1, so the maximum over times is a genuine maximum (Finset.sup').
  • Expectations. Expectations over the uniform order are finite averages 1n!∑π\frac1{n!}\sum_\pin!1​∑π​. No measure theory is used.
  • Values and constants. Values, discounts and ZZZ are real numbers, and the hypotheses d≥0d\ge0d≥0, v≥0v\ge0v≥0 are explicit. The constant 1/41/41/4 is the paper's. The bound is stated multiplicatively, Z/4≤E[A]Z/4\le\mathbf E[\mathcal A]Z/4≤E[A], never as a ratio.
  • Thresholds and ties. Every threshold is non-strict (≥Z/2\ge Z/2≥Z/2), exactly as on pp. 7–8. A\mathcal AA selects the first qualifying time, so it needs no tie-breaking. The tie-breaking remark at Eq. (4.2) concerns only the paper's intermediate identity (4.2), which is not a milestone.
  • Claim 4.8. Both inequalities are stated with cleared denominators. The second carries the proof's case hypothesis 2∣Sacc∣≤n!2|S_{acc}|\le n!2∣Sacc​∣≤n!, which the paper uses in the same place ("at most half the permutations are in SaccS_{acc}Sacc​").
  • What is not this theorem. A\mathcal AA is the online threshold rule with threshold Z/2Z/2Z/2 applied to π\piπ as it unfolds. An algorithm that inspects the whole order, or that chooses its threshold after seeing the values, would make the bound trivial and is not this theorem.
  • Contributions welcome. Proofs of each milestone, including the counting argument of Claim 4.8. Lemmas on averages over Equiv.Perm (Fin n) and on first-hitting times are reusable beyond this mission.

Selected references

  • M. Babaioff, M. Dinitz, A. Gupta, N. Immorlica, K. Talwar, Secretary Problems: Weights and Discounts, Proceedings of the 20th ACM-SIAM Symposium on Discrete Algorithms (SODA), 2009.
  • E. B. Dynkin, Optimal choice of the stopping moment of a Markov process, Doklady Akademii Nauk SSSR 150:238–240, 1963.
  • W. T. Rasmussen, S. R. Pliska, Choosing the maximum from a sequence with a discount function, Applied Mathematics and Optimization 2(3):279–289, 1975/76.
  • M. Mahdian, P. McAfee, D. Pennock, The secretary problem with durable employment, personal communication, 2008 (cited as [MMP08]).
  • M. Babaioff, N. Immorlica, R. Kleinberg, Matroids, secretary problems, and online mechanisms, SODA 2007, pp. 434–443.
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CombinatoricsOperations ResearchProbability+1·Captain: mikedeng1

A Polylogarithmic-Competitive Algorithm for the k-Server Problem: Randomized k-Server Is O(log² k · log³ n · log log n)-Competitive on Every n-Point MetricResearch Paper

Motivation

The k-server problem (Manasse, McGeoch and Sleator, 1990) is the central problem of online computation: kkk servers sit on points of a metric space, requests arrive one at a time at points of the space, and each request must be served by moving a server to it, at a cost equal to the distance travelled. An online algorithm decides without knowing future requests; its quality is its competitive ratio, the worst-case ratio between its cost and the cost of an optimal offline schedule. Paging (caching) is the special case of a uniform metric, and weighted paging the case of a weighted star.

Timeline of the upper bounds for general metrics:

  • 1990: Manasse, McGeoch and Sleator prove that every deterministic algorithm has ratio at least kkk and conjecture that kkk is achievable.
  • 1991: Fiat, Rabani and Ravid give the first ratio depending on kkk only (exponential in kkk).
  • 1995: Koutsoupias and Papadimitriou prove that the work function algorithm is (2k−1)(2k-1)(2k−1)-competitive.
  • For randomized algorithms against an oblivious adversary, the conjectured answer is O(log⁡k)O(\log k)O(logk), achieved for paging (Fiat et al., 1991), but until 2011 nothing better than the deterministic 2k−12k-12k−1 was known for general metrics, even when the ratio may depend on the number of points nnn.
  • 2011: Bansal, Buchbinder, Mądry and Naor give the first polylogarithmic bound, O(log⁡2klog⁡3nlog⁡log⁡n)O(\log^2 k\log^3 n\log\log n)O(log2klog3nloglogn) (arXiv:1110.1580; J. ACM 62(5), 2015, DOI 10.1145/2783434), the result of this mission.

Setting

Let (M,dist)(M,\mathrm{dist})(M,dist) be a finite metric space with nnn points and kkk a number of servers. A configuration C:{1,…,k}→MC:\{1,\dots,k\}\to MC:{1,…,k}→M places server iii at C(i)C(i)C(i). A deterministic online algorithm maps each prefix of the request sequence to a configuration that has a server at the last request; its cost on a sequence ρ\rhoρ is the total distance travelled. OPT(C0,ρ)\mathrm{OPT}(C_0,\rho)OPT(C0​,ρ) is the least cost of any schedule serving ρ\rhoρ from the initial configuration C0C_0C0​. A randomized algorithm is a probability distribution over deterministic online algorithms, all starting at C0C_0C0​; it is ccc-competitive if there is a constant aaa such that its expected cost on every request sequence ρ\rhoρ is at most c⋅OPT(C0,ρ)+ac\cdot\mathrm{OPT}(C_0,\rho)+ac⋅OPT(C0​,ρ)+a.

The paper works with three auxiliary objects. A σ-HST is a rooted tree whose leaves are the points, in which all edges from a node to its children have one common length, equal to 1/σ1/\sigma1/σ times the length of the edge above that node; the distance between two leaves is the length of the tree path. A weighted σ-HST only requires that the edge above a non-root internal node be at least σ\sigmaσ times each edge below it. In the fractional k-server problem on a tree, the state is a vector xxx of server probabilities on the leaves with 0≤xi≤10\le x_i\le10≤xi​≤1 and ∑ixi=k\sum_i x_i=k∑i​xi​=k, a request at leaf iii forces xi=1x_i=1xi​=1, and moving from xxx to x′x'x′ costs ∑vW(v) ∣xv′−xv∣\sum_v W(v)\,|x'_v-x_v|∑v​W(v)∣xv′​−xv​∣, where xvx_vxv​ is the mass below node vvv and W(v)W(v)W(v) the length of the edge above vvv. In the allocation problem on a weighted star with weights wiw_iwi​, requests carry a location iti^tit, a monotone cost vector ht(0)≥⋯≥ht(k)≥0h^t(0)\ge\dots\ge h^t(k)\ge0ht(0)≥⋯≥ht(k)≥0 (the cost of serving with jjj servers there) and a server quota κ(t)≤k\kappa(t)\le kκ(t)≤k.

Formalization targets

Goal: Theorem 1

There is a universal constant C>0C>0C>0 such that for all k≥2k\ge2k≥2, every metric space MMM with n≥3n\ge3n≥3 points and every initial configuration C0C_0C0​, some randomized online algorithm starting at C0C_0C0​ is

C log⁡2k log⁡3n log⁡log⁡n-competitive.C\,\log^2 k\,\log^3 n\,\log\log n\text{-competitive.}Clog2klog3nloglogn-competitive.

Milestones

In the order the proof uses them:

  1. Claim 15: the fix-stage inequality behind the allocation algorithm's analysis.
  2. Theorem 5: for every 0<ε≤10<\varepsilon\le10<ε≤1, a fractional allocation algorithm whose hit cost is at most (1+ε)(Opt+wmax⁡g(κ))+a(1+\varepsilon)(\mathrm{Opt}+w_{\max}g(\kappa))+a(1+ε)(Opt+wmax​g(κ))+a and whose movement cost is at most O(log⁡(k/ε))(Opt+wmax⁡g(κ))+aO(\log(k/\varepsilon))(\mathrm{Opt}+w_{\max}g(\kappa))+aO(log(k/ε))(Opt+wmax​g(κ))+a, where g(κ)=∑t∣κ(t)−κ(t−1)∣g(\kappa)=\sum_t|\kappa(t)-\kappa(t-1)|g(κ)=∑t​∣κ(t)−κ(t−1)∣.
  3. Theorem 6: given such allocation algorithms, an O(ℓlog⁡(kℓ))O(\ell\log(k\ell))O(ℓlog(kℓ))-competitive fractional k-server algorithm on every weighted σ-HST of depth ℓ\ellℓ with σ=Ω(ℓlog⁡(kℓ))\sigma=\Omega(\ell\log(k\ell))σ=Ω(ℓlog(kℓ)).
  4. Theorem 8: every σ-HST with nnn leaves becomes a weighted σ-HST of depth O(log⁡n)O(\log n)O(logn) on the same leaves, with distances distorted by at most 2σ/(σ−1)2\sigma/(\sigma-1)2σ/(σ−1).
  5. Lemma 25 and Theorem 24: on a σ-HST with σ>5\sigma>5σ>5, randomized states consistent with a changing fractional state can be maintained online at cost O(ct)O(c_t)O(ct​) per step.
  6. Theorem 7: on a σ-HST with σ>5\sigma>5σ>5, a ccc-competitive fractional algorithm yields an O(c)O(c)O(c)-competitive randomized one.

Significance

The theorem broke the exponential gap between the Ω(log⁡k)\Omega(\log k)Ω(logk) lower bound and the 2k−12k-12k−1 upper bound for randomized k-server, and showed that randomization helps on every finite metric, not only on uniform or specially structured ones. Its two-level method (a fractional algorithm on trees driven by per-node allocation problems, followed by an online rounding) became the template for later work, including the O(log⁡2k)O(\log^2 k)O(log2k) bound on HSTs of Bubeck, Cohen, Lee, Lee and Mądry (STOC 2018) and Lee's O(log⁡6k)O(\log^6 k)O(log6k) bound on general metrics (FOCS 2018).

The result is proved, in this paper. As far as is known it has no machine-checked proof. Formalizing it means formalizing the analysis of an online algorithm driven by a continuous-time process, a potential-function argument with exact constants, a tree contraction with a distortion bound, and an online randomized rounding against a transportation cost. The allocation, HST and rounding statements are reusable for other online problems on trees (metrical task systems, weighted paging).

Difficulty

For a deterministic or randomized algorithm on a tree, the natural recursion splits the servers of each node among its children. Coté, Meyerson and Poplawski showed that this works if each node solves an allocation problem with a strong guarantee: hit cost within a factor 1+ε1+\varepsilon1+ε of optimal. Integral allocation algorithms cannot achieve this; the integrality gap example of the paper (p. 8) gives a factor Ω(k)\Omega(k)Ω(k). The fractional relaxation avoids the gap, but then the rounding step must keep a randomized state consistent with a fractional state at constant-factor cost, and the HSTs obtained from general metrics have depth growing with the aspect ratio, which a depth-dependent ratio cannot afford. Each of the three reductions (allocation to fractional k-server, deep HST to shallow weighted HST, fractional to randomized) loses only polylogarithmic or constant factors, and the main theorem needs all three at once.

Formalization scope

The k-server model, randomized algorithms and competitiveness are the published definitions KServer_model and KServer_randomized; competitiveness carries an additive constant fixed before the request sequence. Trees are finite rooted trees with a parent map, a depth function and positive edge lengths; points of the k-server problem are the leaves, and the theorems take an arbitrary finite metric space together with a bijection to the leaves and the hypothesis that the distance equals the tree distance. Fractional k-server states have exactly kkk units of mass, each leaf at most 111, and fractional algorithms are measured against the integral offline optimum. The allocation optimum is the integral optimum; cost vectors are finite, non-negative and non-increasing; the diameter of the star is wmax⁡=max⁡iwiw_{\max}=\max_i w_iwmax​=maxi​wi​. The cost of changing a randomized state is the transportation cost over couplings, with minimum-matching cost between configurations. Every O(⋅)O(\cdot)O(⋅) is an explicit constant quantified before the instance, except that in Theorems 7 and 24 and Lemma 25 it may depend on σ\sigmaσ.

Formalizations that make the targets trivial are excluded: the fractional state must place a full server on every request and stay in [0,1][0,1][0,1], the benchmark is the integral optimum (not the algorithm's own or the fractional cost), and no constant may depend on kkk, nnn, the metric or the tree, since otherwise Theorem 1 would follow from the 2k−12k-12k−1 bound.

The proof of Theorem 1 also uses the embedding of Fakcharoenphol, Rao and Talwar [18] of a finite metric into a distribution over σ-HSTs with expected distortion O(σlog⁡σn)O(\sigma\log_\sigma n)O(σlogσ​n). It is an external ingredient, not a result of this paper, and is not a milestone; contributions formalizing it (or Bartal's earlier embedding) are welcome, as are formalizations of the integral optimum's properties on trees (Lemmas 21–22 of the paper), which are not stated here.

Selected references

  • N. Bansal, N. Buchbinder, A. Mądry, J. Naor, A Polylogarithmic-Competitive Algorithm for the k-Server Problem, arXiv:1110.1580v1, 2011; J. ACM 62(5), 2015. https://arxiv.org/abs/1110.1580, https://doi.org/10.1145/2783434
  • M. Manasse, L. McGeoch, D. Sleator, Competitive algorithms for server problems, J. Algorithms 11, 1990. https://doi.org/10.1016/0196-6774(90)90003-W
  • E. Koutsoupias, C. Papadimitriou, On the k-server conjecture, J. ACM 42(5), 1995. https://doi.org/10.1145/210118.210128
  • A. Fiat, R. Karp, M. Luby, L. McGeoch, D. Sleator, N. Young, Competitive paging algorithms, J. Algorithms 12, 1991. https://doi.org/10.1016/0196-6774(91)90041-V
  • J. Fakcharoenphol, S. Rao, K. Talwar, A tight bound on approximating arbitrary metrics by tree metrics, J. Comput. Syst. Sci. 69(3), 2004. https://doi.org/10.1016/j.jcss.2004.04.011
  • A. Coté, A. Meyerson, L. Poplawski, Randomized k-server on hierarchical binary trees, STOC 2008. https://doi.org/10.1145/1374376.1374474
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Operations ResearchOptimization·Captain: mikedeng1

Sequencing with Earliness and Tardiness Penalties: With Due-Date Tolerances, the Least Optimal Common Due Date Puts One Job at an End of Its Tolerance WindowResearch Paper

Motivation

Earliness/tardiness (E/T) scheduling penalizes a job both for finishing late and for finishing early. It models just-in-time production, where an early job ties up inventory and a late one delays a customer. Baker and Scudder's review (Oper. Res. 38 (1990) 22–36) organized the single-machine E/T literature around a short list of structural properties of optimal schedules for a common due date shared by all jobs. For the problem without tolerances these properties go back to work the review surveys, beginning with Kanet (1981) for equal penalties.

The review then turns to due-date tolerances: a job pays nothing if it completes within a window around the due date, as in contracts that accept delivery within a few days of a target. Cheng (1988) studied a version in which the penalty is discontinuous at the window ends. Baker and Scudder state the continuous version and prove two generalized properties, III(G) and IV(G), in the paper's Appendix (pp. 34–35). They are the paper's own results; the rest of the review cites results proved elsewhere.

Setting

Fix n≥1n \ge 1n≥1 jobs, processed on one machine in a fixed order, one after another, starting at time 000 with no idle time between them. The job in position jjj has a processing time pjp_jpj​, so it completes at Cj=p1+⋯+pjC_j = p_1 + \dots + p_jCj​=p1​+⋯+pj​. All jobs share a common due date d∈Rd \in \mathbb Rd∈R, which is a decision variable. Job jjj has tolerances uj,vj≥0u_j, v_j \ge 0uj​,vj​≥0 and is free of penalty when Cj∈[d−uj, d+vj]C_j \in [d - u_j,\ d + v_j]Cj​∈[d−uj​, d+vj​]. Outside its window it pays a unit earliness penalty αj>0\alpha_j > 0αj​>0 or a unit tardiness penalty βj>0\beta_j > 0βj​>0:

Ej=(d−Cj−uj)+,Tj=(Cj−d−vj)+,f(d)=∑j=1n(αjEj+βjTj).E_j = (d - C_j - u_j)^+,\qquad T_j = (C_j - d - v_j)^+,\qquad f(d) = \sum_{j=1}^n \bigl(\alpha_j E_j + \beta_j T_j\bigr).Ej​=(d−Cj​−uj​)+,Tj​=(Cj​−d−vj​)+,f(d)=j=1∑n​(αj​Ej​+βj​Tj​).

The tolerances are small compared with the processing times: pj−vj−ui>0p_j - v_j - u_i > 0pj​−vj​−ui​>0 for distinct jobs i≠ji \ne ji=j. Under this condition at most one job can avoid penalty costs. A due date is optimal if it minimizes fff over R\mathbb RR, and the least optimal due date is the smallest optimal one. The paper minimizes ddd as a secondary criterion when there are alternative optima.

In Lean the model is BakerScudder1990.Tolerance.Instance n, with fields p u v α β : Fin n → ℝ, completion times I.C, earliness I.earliness d, tardiness I.tardiness d, total penalty I.cost d, and the predicates I.IsOptimalDueDate and I.IsLeastOptimalDueDate.

Formalization targets

Goal: Property IV(G)

Let ddd be the least optimal due date and let bbb be the number of jobs with Tj=0T_j = 0Tj​=0. Then a least optimal due date exists, and exactly one of the following holds:

Cb=d+vbwith∑i<bαi<∑i≥bβi,  ∑i<bαi≥∑i>bβi,Cb=d−ubwith∑i<bαi<∑i>bβi,  ∑i≤bαi≥∑i>bβi.\begin{aligned} C_b &= d + v_b \quad\text{with}\quad \textstyle\sum_{i<b}\alpha_i < \sum_{i\ge b}\beta_i,\ \ \sum_{i<b}\alpha_i \ge \sum_{i>b}\beta_i,\\ C_b &= d - u_b \quad\text{with}\quad \textstyle\sum_{i<b}\alpha_i < \sum_{i>b}\beta_i,\ \ \sum_{i\le b}\alpha_i \ge \sum_{i>b}\beta_i. \end{aligned}Cb​Cb​​=d+vb​with∑i<b​αi​<∑i≥b​βi​,  ∑i<b​αi​≥∑i>b​βi​,=d−ub​with∑i<b​αi​<∑i>b​βi​,  ∑i≤b​αi​≥∑i>b​βi​.​

The case labels follow the paper's proof. The printed statement swaps them (see Formalization scope).

Milestones

  1. Case 1 of the proof of III(G). Between the window of job j−1j-1j−1 and the window of job jjj, fff is affine with slope ∑i<jαi−∑i≥jβi\sum_{i<j}\alpha_i - \sum_{i\ge j}\beta_i∑i<j​αi​−∑i≥j​βi​. Before the first window and after the last, the slopes are −∑iβi-\sum_i\beta_i−∑i​βi​ and ∑iαi\sum_i\alpha_i∑i​αi​.
  2. Case 2 of the proof of III(G). Inside the window of job jjj, fff is affine with slope ∑i<jαi−∑i>jβi\sum_{i<j}\alpha_i - \sum_{i>j}\beta_i∑i<j​αi​−∑i>j​βi​.
  3. Property III(G). A least optimal due date exists, and at it some job completes at d−ujd - u_jd−uj​ or at d+vjd + v_jd+vj​.
  4. The two optimality conditions. The first pair of inequalities above makes Cj−vjC_j - v_jCj​−vj​ the least optimal due date, and the second pair makes Cj+ujC_j + u_jCj​+uj​ the least optimal due date.

Significance

III(G) reduces the choice of an optimal common due date for a given sequence to 2n2n2n candidates. IV(G) goes further and names the candidate directly from prefix and suffix sums of the penalties. Baker and Scudder use this to say which V-shaped sequences remain candidates for optimality, so that an enumeration over sequences can discard the others. With uj=vj=0u_j = v_j = 0uj​=vj​=0 the two properties reduce to the classical common-due-date conditions: some job completes exactly at ddd, and which one is fixed by a weighted-median condition.

The results are proved in the paper, so the formalization does not settle an open question. It produces a machine-checked version of the Appendix, with two printed errors corrected, and a reusable model of single-machine E/T costs with tolerance windows. No earliness/tardiness model or result was formalized on Prove2Me as of October 2026.

Difficulty

Each linear piece of fff is elementary. The work lies in showing that the pieces are the claimed ones: the tolerance condition must imply that a job before position jjj is early, and a job after it tardy, throughout each gap and window. That needs the ordering Ci+ui<Cj−vjC_i + u_i < C_j - v_jCi​+ui​<Cj​−vj​ for every i<ji < ji<j, not only for consecutive jobs. The second point is the least optimal due date. Optimality alone does not determine ddd on a flat stretch of fff, where every point is optimal and only the left end satisfies the strict inequalities. Existence of a least minimizer also has to be shown, from the two outer slopes and finitely many breakpoints. Finally, the count bbb of jobs without tardiness must be matched to the position of the critical job at both kinds of breakpoint.

Formalization scope

  • Jobs are indexed by 0-based positions Fin n, so the paper's job bbb is position k=b−1k = b - 1k=b−1 and the goal states the count of untardy jobs as k+1k+1k+1. Data are real numbers. (x)+(x)^+(x)+ is max 0 x.
  • The sequence starts at time 000 and ddd ranges over all of R\mathbb RR; this is the unrestricted problem, which is the one where the paper asserts III(G) and IV(G). Shifting the start time is equivalent to shifting ddd.
  • "In an optimal schedule" is read for a fixed sequence and its least optimal due date. If a sequence and due date are jointly optimal with ddd least among such optima, then ddd is the least optimal due date for that sequence, so this reading implies the paper's.
  • The tolerance condition is assumed only for distinct jobs. That is a weaker hypothesis than the literal "for all pairs (i,j)(i,j)(i,j)", so the theorems are stronger.
  • Errata, corrected and disclosed. (i) IV(G) is printed (p. 30 and p. 35) with its two case labels swapped relative to its own proof. One job with u1,v1>0u_1, v_1 > 0u1​,v1​>0 has least optimal due date C1−v1C_1 - v_1C1​−v1​, so C1=d+v1C_1 = d + v_1C1​=d+v1​ while the first condition pair holds. (ii) In Cases 1 and 2 the identity is printed as f(S)−f(S′)=[… ]εf(S) - f(S') = [\dots]\varepsilonf(S)−f(S′)=[…]ε; the correct one is f(S′)−f(S)=[… ]εf(S') - f(S) = [\dots]\varepsilonf(S′)−f(S)=[…]ε. The milestone texts are quoted as printed; the Lean states the corrected mathematics.
  • Existence of a least optimal due date is a conjunct of III(G) and of IV(G), and both assume n≥1n \ge 1n≥1. A version quantifying only over least optimal due dates without existence would be vacuous. A version for every optimal due date would be false. Neither is acceptable.
  • The optimality conditions are stated as sufficient. Their converse fails when uj=vj=0u_j = v_j = 0uj​=vj​=0.
  • Properties I and II (no inserted idle time, V-shaped sequences) are quoted in the paper, not proved there, and are not formalized. Optimization over sequences is out of scope.
  • Welcome contributions: proofs of the two slope identities (finite sums of max 0 terms with a sign determined on each piece), a general lemma that a convex piecewise-linear coercive function on R\mathbb RR attains its least minimizer at a breakpoint, and the special cases u=v=0u = v = 0u=v=0 as corollaries.

Selected references

  • K. R. Baker and G. D. Scudder, Sequencing with earliness and tardiness penalties: a review, Operations Research 38(1) (1990) 22–36. https://doi.org/10.1287/opre.38.1.22
  • J. J. Kanet, Minimizing the average deviation of job completion times about a common due date, Naval Research Logistics Quarterly 28 (1981) 643–651 (as cited in Baker and Scudder 1990).
  • U. Bagchi, R. S. Sullivan and Y.-L. Chang, Minimizing mean absolute deviation of completion times about a common due date, Naval Research Logistics Quarterly 33 (1986) 227–240 (as cited in Baker and Scudder 1990).
  • T. C. E. Cheng, Optimal common due date with limited completion time deviation, Computers & Operations Research 15 (1988) 91–96 (as cited in Baker and Scudder 1990).
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CombinatoricsMachine LearningOperations Research·Captain: mikedeng1

How Much Data Is Sufficient to Learn High-Performing Algorithms? Generalization Guarantees for Data-Driven Algorithm Design 1: Pseudo-Dimension Bound from a Piecewise-Decomposable Dual ClassResearch Paper

Motivation

Many algorithms in operations research and computer science have tunable parameters: sequence-alignment weights, clustering linkage interpolations, branch-and-bound branching rules, auction reserve prices. In data-driven algorithm design the parameters are chosen by optimizing average performance over a training set of problem instances drawn from an unknown application-specific distribution. The question this mission is about is statistical: how many training instances suffice for the empirical average performance of every parameter setting to be close to its expected performance?

Classical learning theory answers this through the pseudo-dimension of the class of utility functions (Pollard, 1984): a bound on the pseudo-dimension gives a uniform convergence bound of order H(Pdim+ln⁡(1/δ))/NH\sqrt{(\mathrm{Pdim} + \ln(1/\delta))/N}H(Pdim+ln(1/δ))/N​. The difficulty is that utility functions of combinatorial algorithms are wildly discontinuous in the parameters, so standard tools (Lipschitz arguments, linear classes) do not apply. Balcan, DeBlasio, Dick, Kingsford, Sandholm and Vitercik (arXiv:1908.02894v4, STOC 2021) observed that for a large family of algorithms the utility on each fixed instance is a piecewise-structured function of the parameters, and proved a single general theorem converting that structure into a pseudo-dimension bound. Earlier analyses (for example Gupta and Roughgarden 2017; Balcan, Nagarajan, Vitercik and White 2017) derived such bounds one algorithm family at a time; Theorem 3.3 unifies them.

Setting

Let X\mathcal XX be a set of problem instances and U⊆RX\mathcal U \subseteq \mathbb R^{\mathcal X}U⊆RX a class of utility functions; in the paper U={uρ:ρ∈P}\mathcal U = \{u_\rho : \rho \in \mathcal P\}U={uρ​:ρ∈P} for a parameter space P⊆Rd\mathcal P \subseteq \mathbb R^dP⊆Rd, with uρ(x)u_\rho(x)uρ​(x) the performance of the algorithm with parameter ρ\rhoρ on instance xxx.

Pseudo-dimension. A class H\mathcal HH of real functions on a domain Y\mathcal YY shatters points y1,…,yNy_1, \dots, y_Ny1​,…,yN​ if there are targets z1,…,zN∈Rz_1, \dots, z_N \in \mathbb Rz1​,…,zN​∈R such that every one of the 2N2^N2N patterns of "above / not above ziz_izi​" at the points yiy_iyi​ is realized by some h∈Hh \in \mathcal Hh∈H. The pseudo-dimension Pdim(H)\mathrm{Pdim}(\mathcal H)Pdim(H) is the largest NNN for which some NNN points are shattered. For {0,1}\{0,1\}{0,1}-valued classes it is the VC-dimension VCdim(H)\mathrm{VCdim}(\mathcal H)VCdim(H).

Dual class (Definition 3.1). For H⊆RY\mathcal H \subseteq \mathbb R^{\mathcal Y}H⊆RY, each y∈Yy \in \mathcal Yy∈Y gives an evaluation map hy∗:H→Rh^*_y : \mathcal H \to \mathbb Rhy∗​:H→R, hy∗(h)=h(y)h^*_y(h) = h(y)hy∗​(h)=h(y), and H∗={hy∗:y∈Y}\mathcal H^* = \{h^*_y : y \in \mathcal Y\}H∗={hy∗​:y∈Y}. For utility functions, ux∗(uρ)=uρ(x)u^*_x(u_\rho) = u_\rho(x)ux∗​(uρ​)=uρ​(x): the dual function of instance xxx records performance on xxx as the algorithm varies.

Piecewise decomposability (Definition 3.2). Given a class G⊆{0,1}Y\mathcal G \subseteq \{0,1\}^{\mathcal Y}G⊆{0,1}Y of boundary functions, a class F⊆RY\mathcal F \subseteq \mathbb R^{\mathcal Y}F⊆RY of piece functions and k∈Nk \in \mathbb Nk∈N, a class H⊆RY\mathcal H \subseteq \mathbb R^{\mathcal Y}H⊆RY is (F,G,k)(\mathcal F, \mathcal G, k)(F,G,k)-piecewise decomposable if every h∈Hh \in \mathcal Hh∈H admits g(1),…,g(k)∈Gg^{(1)}, \dots, g^{(k)} \in \mathcal Gg(1),…,g(k)∈G and, for each bit vector b∈{0,1}k\boldsymbol b \in \{0,1\}^kb∈{0,1}k, some fb∈Ff_{\boldsymbol b} \in \mathcal Ffb​∈F, with h(y)=fby(y)h(y) = f_{\boldsymbol b_y}(y)h(y)=fby​​(y) where by=(g(1)(y),…,g(k)(y))\boldsymbol b_y = (g^{(1)}(y), \dots, g^{(k)}(y))by​=(g(1)(y),…,g(k)(y)). The theorem applies this to H=U∗\mathcal H = \mathcal U^*H=U∗, so F⊆RU\mathcal F \subseteq \mathbb R^{\mathcal U}F⊆RU and G⊆{0,1}U\mathcal G \subseteq \{0,1\}^{\mathcal U}G⊆{0,1}U, and their duals F∗\mathcal F^*F∗, G∗\mathcal G^*G∗ are classes of functions on F\mathcal FF and G\mathcal GG.

Formalization targets

Goal: Theorem 3.3, explicit form

Suppose U∗\mathcal U^*U∗ is (F,G,k)(\mathcal F, \mathcal G, k)(F,G,k)-piecewise decomposable, k≥1k \ge 1k≥1, dF=Pdim(F∗)d_F = \mathrm{Pdim}(\mathcal F^*)dF​=Pdim(F∗), dG=VCdim(G∗)d_G = \mathrm{VCdim}(\mathcal G^*)dG​=VCdim(G∗) and D=dF+dGD = d_F + d_GD=dF​+dG​. With a=D/ln⁡2a = D/\ln 2a=D/ln2 and b=(D+dGln⁡k)/ln⁡2b = (D + d_G\ln k)/\ln 2b=(D+dG​lnk)/ln2,

Pdim(U)≤4aln⁡(2a)+2b=O(Dln⁡D+dGln⁡k).\mathrm{Pdim}(\mathcal U) \le 4a\ln(2a) + 2b = O\bigl(D\ln D + d_G \ln k\bigr).Pdim(U)≤4aln(2a)+2b=O(DlnD+dG​lnk).

This is the explicit bound behind the printed O(⋅)O(\cdot)O(⋅); it is what the paper's proof establishes.

Milestones, in the order the proof uses them

  1. Lemma 3.4. For h1,…,hNh_1, \dots, h_Nh1​,…,hN​ in a {0,1}\{0,1\}{0,1}-valued class H\mathcal HH (N≥1N \ge 1N≥1),
∣{(h1(y),…,hN(y)):y∈Y}∣≤(eN)VCdim(H∗).|\{(h_1(y), \dots, h_N(y)) : y \in \mathcal Y\}| \le (eN)^{\mathrm{VCdim}(\mathcal H^*)}.∣{(h1​(y),…,hN​(y)):y∈Y}∣≤(eN)VCdim(H∗).
  1. Claim 3.5. For instances x1,…,xNx_1, \dots, x_Nx1​,…,xN​, the class U\mathcal UU splits into M≤(ekN)dGM \le (ekN)^{d_G}M≤(ekN)dG​ cells (strictly fewer when dG≥1d_G \ge 1dG​≥1) on each of which every uxi∗u^*_{x_i}uxi​∗​ coincides with one fixed piece function fi∈Ff_i \in \mathcal Ffi​∈F.
  2. Eq. (7). On any cell, fixed piece functions f1,…,fNf_1, \dots, f_Nf1​,…,fN​ realize at most (eN)dF(eN)^{d_F}(eN)dF​ label vectors (1[fi(u)>zi])i(\mathbb 1[f_i(u) > z_i])_i(1[fi​(u)>zi​])i​.
  3. Eq. (5). The whole class realizes at most (ekN)dG(eN)dF(ekN)^{d_G}(eN)^{d_F}(ekN)dG​(eN)dF​ label vectors (1[u(xi)>zi])i(\mathbb 1[u(x_i) > z_i])_i(1[u(xi​)>zi​])i​.
  4. Shattering inequality. If U\mathcal UU shatters x1,…,xNx_1, \dots, x_Nx1​,…,xN​ (N≥1N \ge 1N≥1), then 2N≤(ekN)dG(eN)dF2^N \le (ekN)^{d_G}(eN)^{d_F}2N≤(ekN)dG​(eN)dF​.
  5. Lemma A.1. For a≥1a \ge 1a≥1, b>0b > 0b>0: y<aln⁡y+by < a\ln y + by<alny+b implies y<4aln⁡(2a)+2by < 4a\ln(2a) + 2by<4aln(2a)+2b.

Significance

Theorem 3.3 is the engine behind every generalization guarantee in the paper. It is instantiated for piecewise-constant and piecewise-linear duals over Rd\mathbb R^dRd (Lemmas 3.8–3.10), and through them for sequence alignment, RNA folding, hierarchical clustering, integer programming (branch-and-bound), greedy algorithms and auction design. Combined with the classical uniform convergence bound, it says that O~(H2(D+dGln⁡k)/ε2)\tilde O(H^2(D + d_G\ln k)/\varepsilon^2)O~(H2(D+dG​lnk)/ε2) training instances suffice to tune any such algorithm to within ε\varepsilonε of its optimal expected performance. The matching lower bounds in the paper (Theorems 4.3 and 5.2) show that the bound is tight up to logarithmic factors.

The result is proved in the paper; to the best of available records it has not been machine-checked. The mission formalizes the known proof, including the dual-class version of Sauer's lemma and the counting argument over the partition induced by the boundary functions. The published Sauer's lemma FoundationsML.RademacherVC.sauer_lemma is included as a reference item, as it is the tool Lemma 3.4 cites.

Difficulty

The obvious approach, bounding the pseudo-dimension of U\mathcal UU directly from the complexity of F\mathcal FF and G\mathcal GG, fails: the piecewise structure lives on the dual side, and nothing about F\mathcal FF or G\mathcal GG themselves controls how U\mathcal UU labels instances. The bound has to pass through dual classes twice and through the dual of a dual once, and Sauer's lemma, which counts labelings of fixed points by varying functions, must be applied in the transposed direction. Formally, the counting step needs bookkeeping of label vectors under a partition indexed by kNkNkN boundary functions, and a conversion from a pseudo-dimension bound on F∗\mathcal F^*F∗ to a VC-dimension bound on the thresholded class {(f,z)↦1[f(u)>z]}\{(f, z) \mapsto \mathbb 1[f(u) > z]\}{(f,z)↦1[f(u)>z]}, which needs the observation that a shattered tuple of pairs has distinct first coordinates.

Formalization scope

  • Pseudo- and VC-dimension are the published FoundationsML predicates Shatters, PseudoDim, GrowthFunction, HasVCDim. The exact-value predicates fix finite dimensions dFd_FdF​, dGd_GdG​, which the paper's bound presupposes. "Pdim(U)≤B\mathrm{Pdim}(\mathcal U) \le BPdim(U)≤B" is stated as "every shattered tuple has length at most BBB". {0,1}\{0,1\}{0,1} is Bool.
  • Sign convention. Shattering uses strict thresholds u(xi)>ziu(x_i) > z_iu(xi​)>zi​; the paper leaves sign(0)\mathrm{sign}(0)sign(0) unspecified, and strict and non-strict thresholds shatter the same tuples, so the dimension is unchanged. Label vectors in the counting milestones use the same reading.
  • Domains. The dual classes are classes of functions on the subtype of the primal class. Parameters ρ\rhoρ are indexed by the functions uρu_\rhouρ​ themselves, and Claim 3.5's partition of P\mathcal PP becomes a partition of U\mathcal UU; nothing in the theorem depends on ρ\rhoρ except through uρu_\rhouρ​.
  • Corrections of the printed statements. (i) Theorem 3.3's O(⋅)O(\cdot)O(⋅) is replaced by the explicit bound 4aln⁡(2a)+2b4a\ln(2a) + 2b4aln(2a)+2b derived from the paper's own last step and Lemma A.1, with k≥1k \ge 1k≥1 added (the printed ln⁡k\ln klnk is undefined at k=0k = 0k=0); the case D=0D = 0D=0 is covered, where the bound is 000. (ii) Lemma 3.4 and the counting milestones assume N≥1N \ge 1N≥1; at N=0N = 0N=0 the printed bounds read 1≤01 \le 01≤0. (iii) Claim 3.5's strict M<(ekN)VCdim(G∗)M < (ekN)^{\mathrm{VCdim}(\mathcal G^*)}M<(ekN)VCdim(G∗) is kept for VCdim(G∗)≥1\mathrm{VCdim}(\mathcal G^*) \ge 1VCdim(G∗)≥1 and weakened to ≤\le≤ only when VCdim(G∗)=0\mathrm{VCdim}(\mathcal G^*) = 0VCdim(G∗)=0, where the strict form is false (M=1M = 1M=1). The milestone texts are quoted verbatim.
  • Dropped hypothesis. The range [0,H][0, H][0,H] of the utility functions is not used by the theorem or its proof and is omitted, which makes the statement more general.
  • Ruling out trivializations. The goal carries the explicit constant, never an O(⋅)O(\cdot)O(⋅) with a constant chosen after the classes; the hypotheses are jointly satisfiable on a nontrivial example (one instance, uρ(x)=ρu_\rho(x) = \rhouρ​(x)=ρ, k=1k = 1k=1, dF=1d_F = 1dF​=1, dG=0d_G = 0dG​=0, in which U\mathcal UU does shatter one point), checked by a sorry-free local verification file; all counts are of subsets of {0,1}N\{0,1\}^N{0,1}N, so no cardinality silently defaults to zero.
  • Contributions welcome: proofs of each milestone; a dual-class Sauer lemma reusable for other data-driven design papers; the passage from pseudo-dimension of F∗\mathcal F^*F∗ to the VC-dimension of its thresholded class.

Selected references

  • M.-F. Balcan, D. DeBlasio, T. Dick, C. Kingsford, T. Sandholm, E. Vitercik, How Much Data Is Sufficient to Learn High-Performing Algorithms? Generalization Guarantees for Data-Driven Algorithm Design, STOC 2021; arXiv:1908.02894v4, 2021. https://arxiv.org/abs/1908.02894
  • P. Assouad, Densité et dimension, Annales de l'Institut Fourier 33(3), 1983. https://doi.org/10.5802/aif.938
  • D. Pollard, Convergence of Stochastic Processes, Springer, 1984. https://doi.org/10.1007/978-1-4612-5254-2
  • N. Sauer, On the density of families of sets, Journal of Combinatorial Theory A 13(1), 1972. https://doi.org/10.1016/0097-3165(72)90019-2
  • S. Shalev-Shwartz, S. Ben-David, Understanding Machine Learning: From Theory to Algorithms, Cambridge University Press, 2014. https://doi.org/10.1017/CBO9781107298019
  • R. Gupta, T. Roughgarden, A PAC approach to application-specific algorithm selection, SIAM Journal on Computing 46(3), 2017. https://doi.org/10.1137/15M1050276
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Secretary Problems: Weights and Discounts 3: An O(log n)-Competitive Algorithm for the Discounted Secretary ProblemResearch Paper

Motivation

In the secretary problem, nnn candidates with arbitrary values arrive one at a time in a uniformly random order, and an online decision maker must accept or reject each candidate on arrival, irrevocably, keeping at most one. The rule that observes the first n/en/en/e candidates and then accepts the first one better than everything seen so far selects the best candidate with probability about 1/e1/e1/e (Dynkin, 1963). The problem is a basic model of online selection and, read economically, of posted-price mechanisms for agents who arrive in random order: a rule that compares each agent only against a threshold set by earlier agents is truthful.

Babaioff, Dinitz, Gupta, Immorlica and Talwar (SODA 2009) study a variant in which time costs value. Selecting the candidate who arrives at time ttt earns that candidate's value multiplied by a discount d(t)d(t)d(t), for an arbitrary non-negative discount function ddd known in advance. Earlier work treated only specific discount shapes, such as geometric discounting d(t)=βtd(t)=\beta^td(t)=βt (Rasmussen and Pliska, 1976). For a general ddd the classical rule can fail badly: if all the discount mass sits in the first few time steps, a rule that waits through a sample of size n/en/en/e earns nothing. The paper shows that the best competitive ratio for arbitrary discounts lies between Ω(log⁡n/log⁡log⁡n)\Omega(\log n/\log\log n)Ω(logn/loglogn) (its Theorem 4.3) and O(log⁡n)O(\log n)O(logn) (its Theorem 4.4). This mission formalizes the upper bound.

Setting

There are n≥1n\ge1n≥1 elements, indexed {0,…,n−1}\{0,\dots,n-1\}{0,…,n−1}, with values v(e)≥0v(e)\ge 0v(e)≥0, and nnn times with discounts d(t)≥0d(t)\ge0d(t)≥0. A uniformly random permutation π\piπ fixes the order of arrivals: element π(t)\pi(t)π(t) arrives at time ttt. An algorithm knows ddd but not vvv; it sees each value on arrival and may select the current element, irrevocably, earning d(t) v(π(t))d(t)\,v(\pi(t))d(t)v(π(t)). Expectations over π\piπ are exact averages over the n!n!n! orders.

The offline optimum on order π\piπ is OPT(π)=max⁡td(t) v(π(t))\mathsf{OPT}(\pi)=\max_t d(t)\,v(\pi(t))OPT(π)=maxt​d(t)v(π(t)); it is a random variable, and the benchmark is its expectation Eπ[OPT]\mathbb E_\pi[\mathsf{OPT}]Eπ​[OPT] (p. 4 of the paper).

Let dmax⁡=max⁡td(t)d_{\max}=\max_t d(t)dmax​=maxt​d(t) and vmax⁡=max⁡ev(e)v_{\max}=\max_e v(e)vmax​=maxe​v(e). For c≥1c\ge1c≥1 the ccc-th discount class is the set of times

Pc={ i:2−cdmax⁡<d(i)≤2−(c−1)dmax⁡ }.P_c=\{\,i : 2^{-c}d_{\max}<d(i)\le 2^{-(c-1)}d_{\max}\,\}.Pc​={i:2−cdmax​<d(i)≤2−(c−1)dmax​}.

The quantity OPTc\mathsf{OPT}_cOPTc​ is the part of Eπ[OPT]\mathbb E_\pi[\mathsf{OPT}]Eπ​[OPT] earned when the optimal time (the smallest time attaining the maximum) lies in PcP_cPc​.

The classical secretary rule on mmm arrivals observes the first ⌊m/e⌋\lfloor m/e\rfloor⌊m/e⌋ and then selects the first arrival that ranks above every earlier arrival. Ranks use a fixed tie-break order: larger value first, and smaller element index among equal values.

The algorithm A\mathcal AA sets M=3⌈log⁡2n⌉+2M=3\lceil\log_2 n\rceil+2M=3⌈log2​n⌉+2, draws c∈{1,…,M}c\in\{1,\dots,M\}c∈{1,…,M} uniformly, and runs the classical rule on the subsequence of arrivals at the times of PcP_cPc​, ignoring all other arrivals.

Formalization targets

Goal: Theorem 4.4 with its explicit constant

Eπ[OPT]  ≤  4e (3⌈log⁡2n⌉+2)  E[A](n≥1, d≥0, v≥0).\mathbb E_\pi[\mathsf{OPT}]\;\le\;4e\,\bigl(3\lceil\log_2 n\rceil+2\bigr)\;\mathbb E[\mathcal A]\qquad(n\ge1,\ d\ge0,\ v\ge0).Eπ​[OPT]≤4e(3⌈log2​n⌉+2)E[A](n≥1, d≥0, v≥0).

The paper states E[OPT]/E[A]≤O(log⁡n)\mathbb E[\mathsf{OPT}]/\mathbb E[\mathcal A]\le O(\log n)E[OPT]/E[A]≤O(logn); the constant 4e4e4e is the one its proof yields.

Milestones

  1. The classical secretary rule selects the top-ranked of m≥1m\ge1m≥1 elements with probability at least 1/e1/e1/e (§2, p. 4).
  2. OPT1≥vmax⁡dmax⁡/n\mathsf{OPT}_1\ge v_{\max}d_{\max}/nOPT1​≥vmax​dmax​/n (proof of Theorem 4.4, p. 7).
  3. OPTc≤2−c 2n2dmax⁡vmax⁡\mathsf{OPT}_c\le 2^{-c}\,2n^2d_{\max}v_{\max}OPTc​≤2−c2n2dmax​vmax​ for every c≥1c\ge1c≥1 (p. 7).
  4. ∑c=13⌈log⁡2n⌉+1OPTc≥12Eπ[OPT]\sum_{c=1}^{3\lceil\log_2 n\rceil+1}\mathsf{OPT}_c\ge\tfrac12\mathbb E_\pi[\mathsf{OPT}]∑c=13⌈log2​n⌉+1​OPTc​≥21​Eπ​[OPT] (p. 7).
  5. E[Ac]≥OPTc/2e\mathbb E[\mathcal A_c]\ge\mathsf{OPT}_c/2eE[Ac​]≥OPTc​/2e for every c≥1c\ge1c≥1, where Ac\mathcal A_cAc​ is the classical rule on PcP_cPc​ (p. 7).

Significance

The theorem shows that a general discount function costs only a logarithmic factor against the offline benchmark, and that one algorithm achieves this without any knowledge of the values. Together with the lower bound of Theorem 4.3 it pins the competitive ratio of the discounted secretary problem between log⁡n/log⁡log⁡n\log n/\log\log nlogn/loglogn and log⁡n\log nlogn. The same scale-splitting idea, stated in the paper as Theorem 4.5 without full proof, extends the bound to the weighted discounted problem.

The result is proved in the paper; to our knowledge it has not been formalized. A complete development would also produce a machine-checked proof of the classical secretary guarantee for the rule with sample size exactly ⌊m/e⌋\lfloor m/e\rfloor⌊m/e⌋ at every finite mmm, with an explicit tie-break, which is reusable by every secretary-type mission. Milestone 1 is that statement. Sharper constants or a smaller class range are welcome as additional statements but do not replace the goal, which is about this algorithm with this MMM.

Difficulty

The obvious argument, running the classical rule on all nnn arrivals, fails because the discounts can be concentrated at times the rule spends sampling. Splitting by discount scale fixes this but creates two problems. First, there are unboundedly many scales, and one has to show that the offline optimum's mass outside the top O(log⁡n)O(\log n)O(logn) of them is negligible against E[OPT]\mathbb E[\mathsf{OPT}]E[OPT], a random quantity rather than a fixed maximum. Second, the classical rule on a class sees only a random subset of the elements, in random order, and the guarantee must be transferred to this subsequence, conditioning on which elements land in PcP_cPc​. Neither step is deep, but both require careful bookkeeping of permutations, and the classical 1/e1/e1/e bound at finite mmm with a floor in the sample size is itself a nontrivial estimate.

Formalization scope

Elements and times are Fin n, an order is π : Equiv.Perm (Fin n) read as time ↦\mapsto↦ element, and the paper's time t=1,…,nt=1,\dots,nt=1,…,n is index t−1t-1t−1. Values and discounts are Fin n → ℝ with non-negativity hypotheses. Every expectation is the finite average 1n!∑π\frac1{n!}\sum_\pin!1​∑π​; the algorithm's random class is the explicit average 1M∑c=1M\frac1M\sum_{c=1}^MM1​∑c=1M​. Maxima are suprema over the finite index set. The logarithm is base 2, ⌈log⁡2n⌉\lceil\log_2 n\rceil⌈log2​n⌉ is Nat.clog 2 n, and the sample size is Nat.floor (m / Real.exp 1). Ties are broken by the order on Lex (ℝ × (Fin n)ᵒᵈ) (larger value, then smaller index); distinct values are not assumed. The optimal time is the smallest maximizing time, so that the OPTc\mathsf{OPT}_cOPTc​ add up to E[OPT]\mathbb E[\mathsf{OPT}]E[OPT]. Competitiveness is stated multiplicatively, never as a quotient, so E[A]=0\mathbb E[\mathcal A]=0E[A]=0 is not a loophole.

The goal is a statement about the specific algorithm A\mathcal AA, not "there exists an algorithm": an existential over unrestricted algorithms is witnessed by a clairvoyant rule that reads the values in advance. A\mathcal AA sees the values only through comparisons among arrivals that have already occurred, and E[OPT]\mathbb E[\mathsf{OPT}]E[OPT] is the expected offline maximum over the same random order, not dmax⁡vmax⁡d_{\max}v_{\max}dmax​vmax​.

Needed infrastructure: averages over permutations and the fact that the elements landing at a fixed set of times form a uniformly random subset in uniformly random order; the finite-mmm analysis of the classical rule; and elementary estimates on geometric sums. Contributions of general lemmas about uniform permutations are welcome and reusable.

Selected references

  • M. Babaioff, M. Dinitz, A. Gupta, N. Immorlica, K. Talwar, Secretary Problems: Weights and Discounts, Proc. 20th ACM-SIAM Symposium on Discrete Algorithms (SODA), 2009. https://doi.org/10.1137/1.9781611973068.139
  • E. B. Dynkin, The optimum choice of the instant for stopping a Markov process, Soviet Math. Doklady 4, 1963.
  • T. S. Ferguson, Who solved the secretary problem?, Statistical Science 4(3), 1989. https://doi.org/10.1214/ss/1177012493
  • L. T. Rasmussen, S. R. Pliska, Choosing the maximum from a sequence with a discount function, Applied Mathematics and Optimization 2, 1976. https://doi.org/10.1007/BF01458209
  • M. Babaioff, N. Immorlica, R. Kleinberg, Matroids, secretary problems, and online mechanisms, SODA 2007. https://dl.acm.org/doi/10.5555/1283383.1283429
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Linear OptimizationOperations ResearchOptimization+1·Captain: mikedeng1

Air Travel Demand and Airline Seat Inventory Management I: Marginal Seat Allocation Among Distinct Fare ClassesTextbook

Why airlines allocate seats by fare class

An airline sells the seats of one flight leg at several prices. Low fares fill seats that would otherwise fly empty; high fares are bought by passengers who book late and cannot be predicted exactly. Seat inventory control decides how many seats each fare class may sell. Peter Belobaba's 1987 MIT dissertation (MIT Flight Transportation Laboratory Report R87-7) gave the probabilistic treatment of this problem that became the expected marginal seat revenue (EMSR) method, which was in use across the airline industry for decades.

This mission formalizes the first, simplest model of the thesis: distinct (non-nested) fare-class inventories on a single leg, where a seat assigned to a class may be sold only in that class or not at all. The thesis surveys this model in Sect. 4.2 (pp. 84–94), where an integer-programming formulation from McDonnell-Douglas and its solution by ranking marginal values are described (p. 90), and develops it probabilistically in Sect. 5.1 (pp. 102–107).

Setting

A leg has capacity nnn seats (the thesis also writes CCC). There are finitely many fare classes iii. Class iii has an average fare fi≥0f_i \ge 0fi​≥0 and receives a random number of requests ri∈{0,1,2,… }r_i \in \{0,1,2,\dots\}ri​∈{0,1,2,…}, with law pip_ipi​. The seats are split into allocations Si∈NS_i \in \mathbb{N}Si​∈N, one per class.

With SSS seats, a class books requests until its seats run out, so its bookings and spill (refused requests) are

b=min⁡(r,S),l=(r−S)+(Eq. (5.3)).b = \min(r, S), \qquad l = (r - S)^+ \qquad \text{(Eq. (5.3))}.b=min(r,S),l=(r−S)+(Eq. (5.3)).

The expected revenue of class iii is Rˉi(Si)=fi⋅bˉi(Si)\bar R_i(S_i) = f_i \cdot \bar b_i(S_i)Rˉi​(Si​)=fi​⋅bˉi​(Si​) with bˉi(Si)=E[min⁡(ri,Si)]\bar b_i(S_i) = E[\min(r_i,S_i)]bˉi​(Si​)=E[min(ri​,Si​)], and the leg's expected revenue is Rˉ=∑iRˉi(Si)\bar R = \sum_i \bar R_i(S_i)Rˉ=∑i​Rˉi​(Si​) (Eq. (5.9)). Write

Pˉi(S)=P[ri≥S],EMSRi(S)=fi⋅Pˉi(S)(Eqs. (5.11), (6.1), (6.2)),\bar P_i(S) = P[r_i \ge S], \qquad \mathrm{EMSR}_i(S) = f_i \cdot \bar P_i(S) \qquad \text{(Eqs. (5.11), (6.1), (6.2))},Pˉi​(S)=P[ri​≥S],EMSRi​(S)=fi​⋅Pˉi​(S)(Eqs. (5.11), (6.1), (6.2)),

the expected marginal seat revenue of the SSS-th seat of class iii. The value of the kkk-th seat of class iii in the integer program of p. 90 is mi(k)=EMSRi(k)m_i(k) = \mathrm{EMSR}_i(k)mi​(k)=EMSRi​(k), k=1,…,nk = 1, \dots, nk=1,…,n.

Formalization targets

Goal: the nnn largest marginal values give the optimal booking limits (p. 90)

Let TTT be any set of nnn pairs (i,k)(i,k)(i,k), 1≤k≤n1 \le k \le n1≤k≤n, such that every mi(k)m_i(k)mi​(k) with (i,k)∈T(i,k) \in T(i,k)∈T is at least every mj(l)m_j(l)mj​(l) with (j,l)∉T(j,l) \notin T(j,l)∈/T, and let SiT=#{k:(i,k)∈T}S^T_i = \#\{k : (i,k) \in T\}SiT​=#{k:(i,k)∈T}. Then ∑iSiT=n\sum_i S^T_i = n∑i​SiT​=n and

∑ifi E[min⁡(ri,Si)]  ≤  ∑ifi E[min⁡(ri,SiT)]for every S with ∑iSi≤n.\sum_i f_i\, E[\min(r_i, S_i)] \;\le\; \sum_i f_i\, E[\min(r_i, S^T_i)] \qquad \text{for every } S \text{ with } \textstyle\sum_i S_i \le n .i∑​fi​E[min(ri​,Si​)]≤i∑​fi​E[min(ri​,SiT​)]for every S with ∑i​Si​≤n.

The goal fixes no distribution, number of classes or fare ordering, and it holds for every tie-breaking among equal marginal values.

Milestones

  1. Eq. (5.6): bˉi(S)+lˉi(S)=rˉi\bar b_i(S) + \bar l_i(S) = \bar r_ibˉi​(S)+lˉi​(S)=rˉi​ for requests of finite mean.
  2. Eq. (5.11): Rˉi(S)−Rˉi(S−1)=fi⋅P[ri≥S]\bar R_i(S) - \bar R_i(S-1) = f_i \cdot P[r_i \ge S]Rˉi​(S)−Rˉi​(S−1)=fi​⋅P[ri​≥S] for S≥1S \ge 1S≥1.
  3. Eqs. (6.1)–(6.2): Pˉi\bar P_iPˉi​ and EMSRi\mathrm{EMSR}_iEMSRi​ are non-increasing in SSS.
  4. Eq. (4.5): the 0–1 vector equal to 111 on a set of nnn largest mi(k)m_i(k)mi​(k) is an optimal solution of the linear program max⁡∑i,kXikmi(k)\max \sum_{i,k} X_{ik} m_i(k)max∑i,k​Xik​mi​(k) subject to ∑Xik≤n\sum X_{ik} \le n∑Xik​≤n, 0≤Xik≤10 \le X_{ik} \le 10≤Xik​≤1.
  5. Eq. (5.13), discrete form: an allocation of exactly CCC seats maximises Rˉ\bar RRˉ among such allocations if and only if some λ\lambdaλ satisfies EMSRi(Si)≥λ\mathrm{EMSR}_i(S_i) \ge \lambdaEMSRi​(Si​)≥λ whenever Si≥1S_i \ge 1Si​≥1 and EMSRi(Si+1)≤λ\mathrm{EMSR}_i(S_i + 1) \le \lambdaEMSRi​(Si​+1)≤λ, for all iii.

Significance

The goal is the reason distinct-inventory allocation is computationally easy: a revenue-maximising allocation is obtained by sorting n×(number of classes)n \times (\text{number of classes})n×(number of classes) numbers, with no search over allocations. The same marginal-value principle underlies the EMSR rules for nested classes in the rest of the thesis, and the identity (5.11) is the link between an expected-revenue function and its marginal seat values used throughout revenue management. Milestone 5 is the integer form of the Lagrangian condition of Eq. (5.13); the thesis states it only for a continuous relaxation, and its equality form is generally unattainable with integer seats.

These results are classical and their proofs are elementary; to our knowledge none of them has been machine-checked. The mission produces a reusable formal model of a single-leg, distinct-inventory allocation problem with integer demand (bookings, spill, revenue and marginal values of a PMF ℕ), and checked statements of the marginal-allocation principle for it.

Difficulty

The thesis argues with continuous densities and derivatives, setting ∂Rˉ/∂Si\partial \bar R / \partial S_i∂Rˉ/∂Si​ equal across classes. That argument does not transfer to integer seats: the derivative of a step-shaped expected-revenue function does not exist, equality of marginal values across classes generally fails at every integer allocation, and the tail probability must be P[r≥S]P[r \ge S]P[r≥S] rather than the P[r>S]P[r > S]P[r>S] of Eq. (5.2) for the marginal identity to hold. The integer statements need their own exchange argument. A second subtlety is ties: "the nnn largest values" is not unique, and the goal must hold for every admissible choice, including choices in which a class's selected seat numbers are not an initial segment {1,…,Si}\{1, \dots, S_i\}{1,…,Si​}.

Formalization scope

All declarations live in the namespace SeatInventory.Distinct. Conventions:

  • Integer demand. The law of class iii's requests is d i : PMF ℕ; expectations are series over N\mathbb{N}N. The thesis's continuous densities are replaced by this discrete model, which the thesis itself requires for seat allocations (p. 103).
  • Tail convention. Pˉ(S)=P[r≥S]\bar P(S) = P[r \ge S]Pˉ(S)=P[r≥S], as in Eq. (6.2) and the prose of Eq. (5.11) ("the probability of selling SiS_iSi​ or more seats"), not the P[r>S]P[r > S]P[r>S] of Eq. (5.2).
  • Seat numbers start at 1, and the pairs (i,k)(i,k)(i,k) range over k∈{1,…,n}k \in \{1, \dots, n\}k∈{1,…,n}, as the 600 variables of a 150-seat, four-class problem on p. 90 indicate.
  • Nonnegative fares fi≥0f_i \ge 0fi​≥0 are assumed in every statement that needs them; with a negative fare the capacity constraint ∑Si≤n\sum S_i \le n∑Si​≤n would not bind and the claims fail.
  • Finite mean of the requests is assumed explicitly for Eq. (5.6); the thesis assumes it silently. Expected bookings are bounded and need no assumption.
  • Capacity. The goal and the LP compare against allocations with ∑iSi≤n\sum_i S_i \le n∑i​Si​≤n (the LP's constraint); milestone 5 compares allocations of exactly CCC seats (Eq. (5.8)).
  • No independence assumption. Expected revenue of distinct inventories depends only on each class's marginal law, so the statements take one law per class.
  • "Decreasing" is non-increasing. The thesis's justification in Sect. 6.1.1 gives only monotonicity; strict decrease fails for bounded demand.
  • LP integrality. "The solution will be integer" is stated as: the indicator of every set of nnn largest values is optimal. With ties the LP also has fractional optima.

The expected revenue in the goal is computed from the booking rule min⁡(ri,Si)\min(r_i, S_i)min(ri​,Si​); it is not defined as a sum of marginal values, and the optimal allocation is not defined as an argmax of Rˉ\bar RRˉ. Either shortcut would make the goal a tautology and is ruled out.

Needed infrastructure: tail sums of a PMF ℕ, telescoping of E[min⁡(r,S)]E[\min(r, S)]E[min(r,S)], and a finite exchange argument for sums of the nnn largest values of a function on a finite set; the last two are reusable for any separable concave resource-allocation problem. Contributions of proofs of any milestone, and of a verified sorting routine that produces a set of nnn largest values, are welcome.

Selected references

  • P. P. Belobaba, Air Travel Demand and Airline Seat Inventory Management, PhD thesis, MIT Flight Transportation Laboratory Report R87-7, 1987 (no DOI).
  • P. P. Belobaba, Airline yield management: an overview of seat inventory control, Transportation Science 21(2), 63–73, 1987. https://doi.org/10.1287/trsc.21.2.63
  • P. P. Belobaba, Application of a probabilistic decision model to airline seat inventory control, Operations Research 37(2), 183–197, 1989. https://doi.org/10.1287/opre.37.2.183
  • K. Littlewood, Forecasting and control of passenger bookings, AGIFORS Symposium Proceedings 12, 1972; reprinted in Journal of Revenue and Pricing Management 4(2), 111–123, 2005. https://doi.org/10.1057/palgrave.rpm.5170134
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CombinatoricsComputational GeometryDiscrete Geometry+1·Captain: mikedeng1

A Polynomial Time Algorithm for Counting Integral Points in Polyhedra When the Dimension is Fixed: The Lattice-Point Count of an Integral Simplex Is a Short Signed Sum over Primitive ConesResearch Paper

Counting lattice points in fixed dimension

How many integral points does a polytope contain? The question arises in integer programming, where it measures the size of a feasible set, in combinatorics, where many enumeration problems are lattice-point counts in a polytope (contingency tables, magic squares, flows), in the representation theory of Lie groups, and in the analysis of loop nests in compilers. Counting is #P-hard when the dimension is part of the input, so the natural question is whether the count can be computed in polynomial time when the dimension ddd is fixed.

Timeline:

  • 1899. In dimension 222, Pick's formula leads to a polynomial algorithm.
  • 1983. Lenstra shows that integer feasibility is decidable in polynomial time for fixed ddd (Lenstra 1983). Deciding whether a lattice point exists does not count them.
  • 1988, 1992. Brion proves that the exponential sum over the lattice points of a rational polytope is the sum of the exponential sums of its vertex cones.
  • 1991. Dyer gives polynomial algorithms in dimensions 333 and 444, based on Dedekind sums (Dyer 1991).
  • 1994. Barvinok proves that for every fixed ddd the number of lattice points of an integral simplex, and hence of a rational polyhedron, can be computed in polynomial time (Barvinok 1994). The algorithm was later implemented (LattE, barvinok) and is the standard method.

Setting

Points of Rd\mathbb{R}^dRd have real coordinates and ⟨c,x⟩=∑lclxl\langle c,x\rangle=\sum_l c_lx_l⟨c,x⟩=∑l​cl​xl​. For integral vectors u1,…,uk∈Zdu_1,\dots,u_k\in\mathbb{Z}^du1​,…,uk​∈Zd, the rational cone they generate is co⁡{u1,…,uk}={∑iλiui:λi≥0}\operatorname{co}\{u_1,\dots,u_k\}=\{\sum_i\lambda_iu_i:\lambda_i\ge0\}co{u1​,…,uk​}={∑i​λi​ui​:λi​≥0}. The generators are simple if they are linearly independent, and primitive if moreover they form a basis of the lattice Zd∩Lin⁡{u1,…,uk}\mathbb{Z}^d\cap\operatorname{Lin}\{u_1,\dots,u_k\}Zd∩Lin{u1​,…,uk​}.

The index Ind⁡K\operatorname{Ind}KIndK of the cone given by simple generators is the number of integral points in the semi-open parallelepiped Π={∑iαiui:0≤αi<1}\Pi=\{\sum_i\alpha_iu_i:0\le\alpha_i<1\}Π={∑i​αi​ui​:0≤αi​<1}. It equals 111 exactly for primitive generators.

The exponential sum of KKK is σ(K;c)=∑x∈K∩Zde⟨c,x⟩\sigma(K;c)=\sum_{x\in K\cap\mathbb{Z}^d}e^{\langle c,x\rangle}σ(K;c)=∑x∈K∩Zd​e⟨c,x⟩. Where it converges it has the closed form

σ(K;c)=(∑x∈Π∩Zde⟨c,x⟩)∏i=1k11−e⟨c,ui⟩,\sigma(K;c)=\Bigl(\sum_{x\in\Pi\cap\mathbb{Z}^d}e^{\langle c,x\rangle}\Bigr)\prod_{i=1}^k\frac{1}{1-e^{\langle c,u_i\rangle}},σ(K;c)=(x∈Π∩Zd∑​e⟨c,x⟩)i=1∏k​1−e⟨c,ui​⟩1​,

and this closed form defines σ\sigmaσ at every regular point, i.e. every ccc with ⟨c,ui⟩≠0\langle c,u_i\rangle\ne0⟨c,ui​⟩=0 for all iii.

An integral simplex is Δ=conv⁡{v1,…,vk+1}\Delta=\operatorname{conv}\{v_1,\dots,v_{k+1}\}Δ=conv{v1​,…,vk+1​} with affinely independent vj∈Zdv_j\in\mathbb{Z}^dvj​∈Zd. Its supporting cone at a vertex vvv is Kv={u:v+δu∈Δ for all sufficiently small δ>0}K_v=\{u:v+\delta u\in\Delta\text{ for all sufficiently small }\delta>0\}Kv​={u:v+δu∈Δ for all sufficiently small δ>0}. A signed decomposition K=∑iεiKiK=\sum_i\varepsilon_iK_iK=∑i​εi​Ki​ with integers εi\varepsilon_iεi​ means χK=∑iεiχKi\chi_K=\sum_i\varepsilon_i\chi_{K_i}χK​=∑i​εi​χKi​​ on all of Rd\mathbb{R}^dRd. The constant term of the Laurent expansion of fff at t=0t=0t=0 is the coefficient of t0t^0t0 in the expansion of fff around its pole at 000.

Formalization targets

Goal: the short signed formula (Theorem 1.2, mathematical content)

For d≥2d\ge2d≥2 and every integral simplex Δ⊆Rd\Delta\subseteq\mathbb{R}^dΔ⊆Rd there are, for each vertex vjv_jvj​, primitive cones Kj,iK_{j,i}Kj,i​ and integers εj,i\varepsilon_{j,i}εj,i​ with Kvj=∑iεj,iKj,iK_{v_j}=\sum_i\varepsilon_{j,i}K_{j,i}Kvj​​=∑i​εj,i​Kj,i​ and at most (2d)Tj(2^d)^{T_j}(2d)Tj​ terms. Here TjT_jTj​ is the smallest integer

Tj≥−log⁡log⁡1.9+log⁡log⁡Ind⁡jlog⁡d−log⁡(d−1),T_j\ge\frac{-\log\log1.9+\log\log\operatorname{Ind}_j}{\log d-\log(d-1)},Tj​≥logd−log(d−1)−loglog1.9+loglogIndj​​,

and Ind⁡j\operatorname{Ind}_jIndj​ is the index of the edge vectors at vjv_jvj​. Moreover, for every ccc orthogonal to no generator of any Kj,iK_{j,i}Kj,i​,

#(Δ∩Zd)=∑j∑iεj,i R(Kj,i,vj,c),\#(\Delta\cap\mathbb{Z}^d)=\sum_j\sum_i\varepsilon_{j,i}\,R(K_{j,i},v_j,c),#(Δ∩Zd)=j∑​i∑​εj,i​R(Kj,i​,vj​,c),

where R(K,v,c)R(K,v,c)R(K,v,c) is the constant term at t=0t=0t=0 of t↦et⟨c,v⟩σ(K;tc)t\mapsto e^{t\langle c,v\rangle}\sigma(K;tc)t↦et⟨c,v⟩σ(K;tc).

Milestones

  1. Proposition 2.4 with Remark 2.5: the closed form of σ\sigmaσ for simple cones.
  2. Proposition 4.1: for primitive cones, σ(K;c)=∏i(1−e⟨c,ui⟩)−1\sigma(K;c)=\prod_i(1-e^{\langle c,u_i\rangle})^{-1}σ(K;c)=∏i​(1−e⟨c,ui​⟩)−1.
  3. Proposition 2.7 (Brion), for integral simplices.
  4. Corollary 4.2: R(K,v,c)=Qk(x;y)∏ixi−1R(K,v,c)=Q_k(x;y)\prod_ix_i^{-1}R(K,v,c)=Qk​(x;y)∏i​xi−1​ with deg⁡Qk≤k\deg Q_k\le kdegQk​≤k.
  5. Primitive generators iff Ind⁡K=1\operatorname{Ind}K=1IndK=1 (§5).
  6. Lemma 5.2: a short lattice vector www with Ind⁡Kj≤(Ind⁡K)(d−1)/d\operatorname{Ind}K_j\le(\operatorname{Ind}K)^{(d-1)/d}IndKj​≤(IndK)(d−1)/d.
  7. Lemma 5.3: at most 2d2^d2d cones of smaller index, with signs ±1\pm1±1.
  8. Theorem 5.4: decomposition into at most (2d)T(2^d)^T(2d)T primitive cones.
  9. The display in the proof of Theorem 5.4: (2d)T≤C1(d)(log⁡Ind⁡K)C2(d)(2^d)^T\le C_1(d)(\log\operatorname{Ind}K)^{C_2(d)}(2d)T≤C1​(d)(logIndK)C2​(d).
  10. Lemma 6.1: some c(t)=(1,t,…,td−1)c(t)=(1,t,\dots,t^{d-1})c(t)=(1,t,…,td−1), t∈{0,…,m(d−1)}t\in\{0,\dots,m(d-1)\}t∈{0,…,m(d−1)}, is orthogonal to none of mmm nonzero vectors.

Significance

The goal is the reason Barvinok's algorithm is polynomial. For fixed ddd, the number of terms is bounded by a polynomial in log⁡Ind⁡K\log\operatorname{Ind}KlogIndK, which is polynomial in the input size. Each term is an explicit rational function of inner products (Corollary 4.2). The identity therefore turns lattice-point counting into the evaluation of a short sum. Its consequences include polynomial-time counting for rational polyhedra in fixed dimension, polynomial-time computation of Ehrhart quasi-polynomials, and the theory of short rational generating functions (Barvinok–Woods), which underlies algorithms for parametric integer programming.

The result is proved and classical. As far as known it has not been machine-checked: Mathlib has convex cones, Minkowski's convex body theorem and lattices, but no signed cone decompositions, no generating functions of cones and no Brion identity. The mission produces a formal account of the algorithm's correctness and of the size of its output. Its milestones are statements of independent use: the closed form of cone generating functions, Brion's identity for simplices, and the index-reduction lemma.

Difficulty

The obvious approach is to triangulate the supporting cones into unimodular (primitive) cones. This fails: a cone of index Ind⁡K\operatorname{Ind}KIndK may need about Ind⁡K\operatorname{Ind}KIndK unimodular cones in any triangulation, which is exponential in the input size. The step that makes the count small is signed decomposition. Signed decomposition uses cones that are not contained in KKK, combined with signs ±1\pm1±1, and controls the index through the geometry of numbers rather than through a subdivision of KKK. The second difficulty is that c=0c=0c=0, where the exponential sum equals the count, is a singular point of every σ(Ki;⋅)\sigma(K_i;\cdot)σ(Ki​;⋅). The count is recovered as a constant term of a Laurent expansion, so every identity has to be valid as an identity of meromorphic functions on regular points, and not only where the series converge.

Formalization scope

  • Points of Rd\mathbb{R}^dRd are Fin d → ℝ, integral vectors Fin d → ℤ used through their real cast, and ⟨⋅,⋅⟩\langle\cdot,\cdot\rangle⟨⋅,⋅⟩ is dotProduct. A cone is given by its generator list, because index, parallelepiped and the closed form of σ\sigmaσ depend on the generators. Logarithms are natural, and ∣u∣|u|∣u∣ is the sup norm.
  • Theorem 1.2 is represented by its mathematical content. The paper's statement is "there exists a polynomial time algorithm". No machine model is formalized. The goal is the identity proved on p. 778, with the count of the proof of Theorem 5.4 (p. 777). The algorithmic clauses of Lemmas 5.2, 5.3, 6.1 and Theorem 5.4 are each replaced by the existence statement of the object the algorithm constructs. Lemma 5.3(c), whose constant is unquantified, is omitted.
  • Over R\mathbb{R}R. The paper uses c∈Cdc\in\mathbb{C}^dc∈Cd only to speak of meromorphic functions. Here ccc is real, σ\sigmaσ is defined by its closed form, and regularity means ⟨c,ui⟩≠0\langle c,u_i\rangle\ne0⟨c,ui​⟩=0 for every generator. The constant term is a predicate: tNf(t)t^Nf(t)tNf(t) agrees near 000 with a real-analytic function whose NNN-th Taylor coefficient is the value.
  • Added hypotheses. These are d≥2d\ge2d≥2 wherever TTT appears, k≥1k\ge1k≥1 in Lemma 5.2, d≥1d\ge1d≥1 in Lemma 5.3, ui≠0u_i\ne0ui​=0 in Lemma 6.1, and Ind⁡K≥2\operatorname{Ind}K\ge2IndK≥2 in the display bound. T=0T=0T=0 when the index is 111. Brion's identity is stated for integral simplices, the only case the proof uses.
  • Trivializations ruled out. σ\sigmaσ is never an infinite sum, which would take a junk value off its convergence region. "Primitive" means a lattice basis and not mere linear independence; with the weaker notion the decomposition is trivial. Decompositions hold for every x∈Rdx\in\mathbb{R}^dx∈Rd, not only on Zd\mathbb{Z}^dZd. The halfspace of Lemma 5.2 is linear, since an affine one would make it vacuous.
  • Infrastructure. A complete development needs generating functions of simplicial cones, Brion's theorem for simplices, the identity theorem for rational functions in ec1,…,ecde^{c_1},\dots,e^{c_d}ec1​,…,ecd​, Minkowski's theorem on a sublattice, and inclusion–exclusion for triangulations. Each is reusable beyond this mission, and contributions of any of these pieces are welcome.

Selected references

  • A. I. Barvinok, A polynomial time algorithm for counting integral points in polyhedra when the dimension is fixed, Mathematics of Operations Research 19(4), 1994, 769–779. https://doi.org/10.1287/moor.19.4.769
  • M. Brion, Points entiers dans les polyèdres convexes, Annales scientifiques de l'École Normale Supérieure 21(4), 1988, 653–663. https://doi.org/10.24033/asens.1572
  • M. Dyer, On counting lattice points in polyhedra, SIAM Journal on Computing 20(4), 1991, 695–707. https://doi.org/10.1137/0220044
  • H. W. Lenstra Jr., Integer programming with a fixed number of variables, Mathematics of Operations Research 8(4), 1983, 538–548. https://doi.org/10.1287/moor.8.4.538
  • R. P. Stanley, Enumerative Combinatorics, Vol. 1, Wadsworth & Brooks/Cole, 1986, §4.6. https://doi.org/10.1007/978-1-4615-9763-6
  • A. Barvinok, K. Woods, Short rational generating functions for lattice point problems, Journal of the AMS 16(4), 2003, 957–979. https://doi.org/10.1090/S0894-0347-03-00428-4
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Operations ResearchOptimizationProbability·Captain: mikedeng1

Air Travel Demand and Airline Seat Inventory Management II: The EMSR Protection Level for Two Nested Fare ClassesTextbook

Why airlines protect seats

An airline sells the seats of one flight in several fare classes at different prices, all drawn from one shared cabin. Discount fares are bought early, under advance-purchase restrictions, while most high-fare requests arrive close to departure. Accepting every early low-fare request fills the aircraft with cheap passengers and turns away late high-fare passengers; refusing too many leaves seats empty. Seat inventory control decides how many seats to keep away from the low fare. Peter Belobaba's 1987 MIT thesis (Flight Transportation Laboratory Report R87-7) introduced the expected marginal seat revenue (EMSR) model for this decision, and EMSR-type rules remain the basis of the booking-limit logic in airline revenue management systems.

Timeline. Littlewood (1972, AGIFORS Symposium Proceedings; reprinted 2005) proposed accepting a low-fare request as long as its fare is at least the high fare times the probability of selling all remaining seats to high-fare passengers. Analysts at Trans World Airlines (1973) and Richter at Lufthansa (1982) gave equivalent formulations for the dynamic case. Belobaba (1987, Ch. 5) restated the two-class rule as a static protection level for nested inventories and extended it heuristically to many classes. Brumelle and McGill (Operations Research 41, 1993) and Curry (Transportation Science 24, 1990) later proved optimality of nested protection levels for any number of classes under low-to-high arrivals, and showed that Belobaba's multi-class EMSR levels are not optimal for three or more classes. This mission concerns only the two-class result, which is correct.

Setting

A single flight leg has capacity C∈NC \in \mathbb NC∈N. Class 1 has fare f1f_1f1​, class 2 has fare f2f_2f2​, with 0≤f2≤f10 \le f_2 \le f_10≤f2​≤f1​. The numbers of requests for the two classes are random variables r1,r2r_1, r_2r1​,r2​ with values in N\mathbb NN, defined on a probability space (Ω,μ)(\Omega, \mu)(Ω,μ) and independent. There are no cancellations, no no-shows, and a refused request is lost.

The inventory is nested: a class-1 request is accepted as long as any seat is unsold. A protection level S∈{0,…,C}S \in \{0, \dots, C\}S∈{0,…,C} is the number of seats reserved for class 1; it sets the class-2 booking limit BL2=C−SBL_2 = C - SBL2​=C−S. All class-2 requests arrive before any class-1 request. Class 2 therefore books min⁡(r2,C−S)\min(r_2, C - S)min(r2​,C−S) seats and class 1 books min⁡(r1,C−min⁡(r2,C−S))\min(r_1, C - \min(r_2, C-S))min(r1​,C−min(r2​,C−S)), and the realised revenue is

RS=f2min⁡(r2,C−S)+f1min⁡(r1, C−min⁡(r2,C−S)).R_S = f_2 \min(r_2, C - S) + f_1 \min\bigl(r_1,\, C - \min(r_2, C - S)\bigr).RS​=f2​min(r2​,C−S)+f1​min(r1​,C−min(r2​,C−S)).

The expected revenue is Rˉ(S)=E[RS]\bar R(S) = \mathbb E[R_S]Rˉ(S)=E[RS​].

The tail probability of class 1 is Pˉ1(S)=P[r1≥S]\bar P_1(S) = P[r_1 \ge S]Pˉ1​(S)=P[r1​≥S], the probability of receiving SSS or more class-1 requests, and the expected marginal seat revenue of the SSS-th class-1 seat is

EMSR1(S)=f1⋅Pˉ1(S).\mathrm{EMSR}_1(S) = f_1 \cdot \bar P_1(S).EMSR1​(S)=f1​⋅Pˉ1​(S).

For a single class with SSS seats the expected revenue is f1 E[min⁡(r1,S)]f_1\,\mathbb E[\min(r_1, S)]f1​E[min(r1​,S)], and EMSR1(S)\mathrm{EMSR}_1(S)EMSR1​(S) is its increment from S−1S-1S−1 to SSS seats. The EMSR protection level S21S_2^1S21​ is the largest integer S∈{0,…,C}S \in \{0, \dots, C\}S∈{0,…,C} with

EMSR1(S)≥f2.\mathrm{EMSR}_1(S) \ge f_2 .EMSR1​(S)≥f2​.

In Lean these objects are nestedRevenue, expectedNestedRevenue, tailProb, classRevenue, emsr and emsrProtectionLevel in SeatInventory.Nested.

Formalization targets

Goal: Eqs. (5.15)–(5.16), optimality of the EMSR protection level

Rˉ(S)≤Rˉ(S21)for all S∈{0,…,C}.\bar R(S) \le \bar R(S_2^1) \qquad \text{for all } S \in \{0, \dots, C\}.Rˉ(S)≤Rˉ(S21​)for all S∈{0,…,C}.

The goal fixes no distribution: it holds for every pair of independent N\mathbb NN-valued demands, and S21S_2^1S21​ depends only on f2/f1f_2/f_1f2​/f1​ and the law of r1r_1r1​.

Milestones

  1. Eq. (5.11). f1E[min⁡(r1,S)]−f1E[min⁡(r1,S−1)]=f1P[r1≥S]f_1\mathbb E[\min(r_1,S)] - f_1\mathbb E[\min(r_1,S-1)] = f_1 P[r_1 \ge S]f1​E[min(r1​,S)]−f1​E[min(r1​,S−1)]=f1​P[r1​≥S] for S≥1S \ge 1S≥1.
  2. Eqs. (6.1)–(6.2). Pˉ1\bar P_1Pˉ1​ and, for f1≥0f_1 \ge 0f1​≥0, EMSR1\mathrm{EMSR}_1EMSR1​ are non-increasing in SSS.
  3. Eq. (4.8), Littlewood's rule, already on the platform as RevenueManagement.littlewood_marginal_value (Talluri and van Ryzin's Eq. (2.1), proved).
  4. Sect. 5.2, p. 112. Rˉ(S)≤Rˉ(S21)\bar R(S) \le \bar R(S_2^1)Rˉ(S)≤Rˉ(S21​) for S21≤S≤CS_2^1 \le S \le CS21​≤S≤C: a smaller booking limit for class 2 cannot raise expected revenue.
  5. Sect. 5.2, p. 114. With the same class-2 limit C−SC - SC−S, the expected nested revenue is at least the expected revenue of two distinct inventories with SSS and C−SC - SC−S seats, strictly if f1>0f_1 > 0f1​>0 and P[r2<C−S, r1>S]>0P[r_2 < C - S,\ r_1 > S] > 0P[r2​<C−S, r1​>S]>0.

Significance

The two-class result says that, for a static booking limit set once before sales open and low-fare demand arriving first, the airline needs only the high-fare demand distribution and the fare ratio to set the optimal limit; the low-fare forecast is irrelevant. This is the rule that the thesis then applies class by class in multi-class nested systems, and it is the base case against which the later exact multi-class theory (Brumelle–McGill, Curry) is checked. Milestone 5 makes precise why nested inventories dominate the distinct-inventory allocation of the thesis's Sect. 5.1 with the same class-2 limit.

The result is classical and proved, in the sense that the optimality of a two-class threshold policy follows from Littlewood's argument and from the dynamic-programming treatment in Talluri and van Ryzin's The Theory and Practice of Revenue Management (2004, Ch. 2). On Prove2Me, Littlewood's marginal rule and the dynamic-programming optimality of nested protection levels (RevenueManagement.static_optimal_controls) are formalized, but in Bellman form: there the protection level is defined through the value function of a dynamic program. What is not formalized is the statement in Belobaba's form, where the protection level is the explicit threshold of f1P[r1≥S]f_1 P[r_1 \ge S]f1​P[r1​≥S] against f2f_2f2​ and the objective is the explicit expected revenue of a booking limit. Connecting the two forms, and the comparison with distinct inventories, is the work of this mission.

Difficulty

The expected revenue couples the two demands through the capacity left by class 2, so Rˉ\bar RRˉ is not a sum of single-class revenues and is not separately concave in an obvious way. The step that requires care is the increment Rˉ(S)−Rˉ(S−1)\bar R(S) - \bar R(S-1)Rˉ(S)−Rˉ(S−1): it is not EMSR1(S)−f2\mathrm{EMSR}_1(S) - f_2EMSR1​(S)−f2​, as the thesis's sentence after the milestone on p. 112 suggests, because the extra protected seat matters only on the event that class 2 would have reached its limit. Independence of r1r_1r1​ and r2r_2r2​ is what makes that event's probability factor out; without independence the threshold rule is not optimal. The discrete reading matters too: with P[r1>S]P[r_1 > S]P[r1​>S] in place of P[r1≥S]P[r_1 \ge S]P[r1​≥S] the rule is off by one seat and the claim fails.

Formalization scope

Conventions the Lean statements commit to:

  • Demands are N\mathbb NN-valued measurable random variables r₁ r₂ : Ω → ℕ on a probability space μ; the goal and milestone 4 assume IndepFun r₁ r₂ μ. The thesis writes continuous densities (Eqs. (5.1)–(5.5)) but requires integer seat counts; the discrete model is used throughout.
  • Pˉ1(S)=P[r1≥S]\bar P_1(S) = P[r_1 \ge S]Pˉ1​(S)=P[r1​≥S], as in Eq. (6.2) and the prose of Eq. (5.11), not P[r1>S]P[r_1 > S]P[r1​>S] as in Eq. (5.2).
  • The EMSR protection level is the largest S∈{0,…,C}S \in \{0,\dots,C\}S∈{0,…,C} with f1P[r1≥S]≥f2f_1 P[r_1 \ge S] \ge f_2f1​P[r1​≥S]≥f2​ (Eq. (5.15)); Eq. (5.16)'s equality is the continuous idealisation and is not stated.
  • Booking order: all class-2 requests precede all class-1 requests (pp. 108, 112). This order is built into the revenue formula, not assumed separately.
  • Fares satisfy 0≤f2≤f10 \le f_2 \le f_10≤f2​≤f1​; the thesis has f1>f2f_1 > f_2f1​>f2​, and the statements also cover equality.
  • Expectations are Bochner integrals of bounded revenues, probabilities are μ.real; seat counts use truncated subtraction only where S≤CS \le CS≤C.

A trivializing formalization is ruled out: S21S_2^1S21​ is defined by the threshold of (5.15), never as an argmax of expected revenue, and the expected revenue is computed from the realised revenue of the booking process, not postulated as a sum of marginal terms.

The multi-class EMSR levels of Eqs. (5.19)–(5.29) and the dynamic revision of Eqs. (5.31)–(5.32) are out of scope. Proofs need the discrete expectation identity E[min⁡(r,S)]−E[min⁡(r,S−1)]=P[r≥S]\mathbb E[\min(r,S)] - \mathbb E[\min(r,S-1)] = P[r \ge S]E[min(r,S)]−E[min(r,S−1)]=P[r≥S] and expectation of products of independent bounded functions, both in Mathlib's reach and reusable for other single-leg revenue models. Proofs of any milestone, and a proof of the goal from milestones 1, 2 and 4 plus the matching lower-half argument, are welcome.

Selected references

  • P. P. Belobaba, Air Travel Demand and Airline Seat Inventory Management, PhD thesis, MIT, Flight Transportation Laboratory Report R87-7, 1987 (no DOI).
  • K. Littlewood, Forecasting and control of passenger bookings, AGIFORS Symposium Proceedings 12, 1972; reprinted in Journal of Revenue and Pricing Management 4, 2005. https://doi.org/10.1057/palgrave.rpm.5170134
  • S. L. Brumelle and J. I. McGill, Airline seat allocation with multiple nested fare classes, Operations Research 41, 1993. https://doi.org/10.1287/opre.41.1.127
  • R. E. Curry, Optimal airline seat allocation with fare classes nested by origins and destinations, Transportation Science 24, 1990. https://doi.org/10.1287/trsc.24.3.193
  • K. T. Talluri and G. J. van Ryzin, The Theory and Practice of Revenue Management, Springer, 2004. https://doi.org/10.1007/b139000
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Operations ResearchOptimizationProbability·Captain: mikedeng1

Air Travel Demand and Airline Seat Inventory Management III: Gaussian EMSR Protection Levels and Their SensitivityTextbook

Why protection levels and their inputs matter

An airline sells the seats of one flight leg in several fare classes at different prices. Low-fare passengers usually book first, so the airline must decide how many seats to keep back, or protect, for later high-fare passengers. Peter Belobaba's 1987 MIT dissertation introduced the expected marginal seat revenue (EMSR) rule for this decision, and EMSR-type rules became a standard of airline revenue management practice (Talluri and van Ryzin 2004). A protection level is computed from a demand forecast, and forecasts are uncertain. Section 6.2 of the dissertation asks how the protection level moves when its inputs move: the mean of forecast demand, its standard deviation, and the ratio of the two fares. That question decides where forecasting effort pays off, and this mission formalizes the answers the dissertation gives for Gaussian demand.

This is the third mission in a series on the dissertation. The first treats marginal allocation among distinct fare classes, and the second the two-class nested protection level in the discrete model, including its revenue optimality. This mission takes the continuous Gaussian model of Chapter 6 on its own terms.

Setting

Let rrr be the number of requests for a fare class, a real random variable with law μ\muμ. For a seat level S∈RS \in \mathbb RS∈R the tail probability is

Pˉ(S)=P[r≥S],\bar P(S) = P[r \ge S],Pˉ(S)=P[r≥S],

and for the fare fff of the class the expected marginal seat revenue is EMSR(S)=Pˉ(S)⋅f\mathrm{EMSR}(S) = \bar P(S)\cdot fEMSR(S)=Pˉ(S)⋅f (Eqs. (6.1)–(6.2)).

There are two classes: class 1 with fare f1f_1f1​ and class 2 with fare f2f_2f2​, where 0<f2<f10 < f_2 < f_10<f2​<f1​. Requests for class 1 are Gaussian with estimated mean rˉ\bar rrˉ and estimated standard deviation σ^>0\hat\sigma > 0σ^>0, written r1∼N(rˉ,σ^2)r_1 \sim N(\bar r, \hat\sigma^2)r1​∼N(rˉ,σ^2). A real number SSS is an EMSR protection level for class 1 against class 2 when

Pˉ1(S)=P[r1≥S]=f2f1(Eq. (6.10)).\bar P_1(S) = P[r_1 \ge S] = \frac{f_2}{f_1} \qquad \text{(Eq. (6.10))}.Pˉ1​(S)=P[r1​≥S]=f1​f2​​(Eq. (6.10)).

The standardized level ZZZ is the value "which has a probability of f2/f1f_2/f_1f2​/f1​ of being exceeded" by a standard normal variable:

P[N(0,1)≥Z]=f2f1.P[N(0,1) \ge Z] = \frac{f_2}{f_1}.P[N(0,1)≥Z]=f1​f2​​.

In the Lean development these are tailProb, emsr, gaussianLaw rbar σ, stdNormal, IsProtectionLevel rbar σ f₁ f₂ S and IsStdNormalLevel f₁ f₂ Z, all in the namespace SeatInventory.Gaussian.

Formalization targets

Goal: the Gaussian protection level and its sensitivity to σ^\hat\sigmaσ^

For σ^>0\hat\sigma > 0σ^>0 and 0<f2<f10 < f_2 < f_10<f2​<f1​:

  1. Eq. (6.10) has exactly one solution SSS, and the standard normal equation has exactly one solution ZZZ;
  2. they satisfy
S=rˉ+Zσ^(Eq. (6.12));S = \bar r + Z\hat\sigma \qquad \text{(Eq. (6.12))};S=rˉ+Zσ^(Eq. (6.12));
  1. Z<0Z < 0Z<0 if f2/f1>1/2f_2/f_1 > 1/2f2​/f1​>1/2, Z>0Z > 0Z>0 if f2/f1<1/2f_2/f_1 < 1/2f2​/f1​<1/2, Z=0Z = 0Z=0 if f2/f1=1/2f_2/f_1 = 1/2f2​/f1​=1/2 (Eq. (6.14)), and S=rˉS = \bar rS=rˉ in the last case;
  2. if σ^′>σ^\hat\sigma' > \hat\sigmaσ^′>σ^ and S′S'S′ solves (6.10) for N(rˉ,σ^′2)N(\bar r, \hat\sigma'^2)N(rˉ,σ^′2), then S′<SS' < SS′<S, S′>SS' > SS′>S or S′=SS' = SS′=S according as f2/f1f_2/f_1f2​/f1​ is above, below or equal to 1/21/21/2.

The goal states no numerical constant and no particular fare ratio; it fixes only the shape of the dependence.

Milestones, in attack order

  • Eq. (6.1)–(6.2): for any request law, Pˉ\bar PPˉ and EMSR\mathrm{EMSR}EMSR are non-increasing in SSS.
  • Eq. (6.10): the Gaussian protection level exists and is unique.
  • Eq. (6.11)–(6.12): S=rˉ+Zσ^S = \bar r + Z\hat\sigmaS=rˉ+Zσ^.
  • p. 154: with σ^\hat\sigmaσ^ and the fares fixed, replacing rˉ\bar rrˉ by rˉ+c\bar r + crˉ+c replaces SSS by S+cS + cS+c.
  • Eq. (6.14): the sign of ZZZ, and S=rˉS = \bar rS=rˉ at fare ratio 1/21/21/2 for every σ^\hat\sigmaσ^.
  • p. 154: the effect of σ^\hat\sigmaσ^ on SSS (part 4 of the goal on its own).
  • p. 157: ZZZ and SSS decrease strictly as the fare ratio f2/f1f_2/f_1f2​/f1​ increases.

The dissertation's constant-coefficient-of-variation form, Eq. (6.13), S=rˉ(1+Zk)S = \bar r(1 + Zk)S=rˉ(1+Zk) with k=σ^/rˉk = \hat\sigma/\bar rk=σ^/rˉ, follows from (6.12) by substitution and is not stated separately.

Significance

The result gives every Gaussian protection level as a closed form in one standard normal quantile. From it come the three sensitivities that Sect. 6.2 uses to argue for better forecasts. The protection level moves one-for-one with mean demand. The standard deviation moves it in a direction fixed only by whether the discount fare is above or below half the full fare. A higher fare ratio always lowers it. The dissertation uses these facts, and its Figures 6.1 and 6.2, to argue that reducing the estimated standard deviation of demand narrows the range of protection levels a forecast can produce. The same quantile structure is behind Littlewood's rule and the newsvendor critical fractile, so the statements here are the Gaussian specialization of a pattern that recurs throughout revenue management and inventory theory.

All the statements are classical and easy to believe. None of them, to our knowledge, has a machine-checked proof. Mathlib provides the Gaussian law and its affine images, but no standard normal quantile and no statement that a Gaussian tail is a strictly decreasing bijection onto (0,1)(0,1)(0,1). Formalizing this mission produces both, in a form that can be used again wherever a normal critical fractile appears.

Difficulty

Most of the work is in the existence and uniqueness of the two tail solutions. The tail S↦P[r1≥S]S \mapsto P[r_1 \ge S]S↦P[r1​≥S] must be shown continuous, strictly decreasing, and to take every value in (0,1)(0,1)(0,1). Strictness needs the Gaussian density to be positive everywhere, and existence needs a limit argument at both ends. Monotonicity alone, which holds for every law (Eqs. (6.1)–(6.2)), gives neither, because a general law can have flat stretches and jumps in its tail. The relation S=rˉ+Zσ^S = \bar r + Z\hat\sigmaS=rˉ+Zσ^ then requires transporting the tail of N(rˉ,σ^2)N(\bar r,\hat\sigma^2)N(rˉ,σ^2) to that of N(0,1)N(0,1)N(0,1) through the affine map x↦(x−rˉ)/σ^x \mapsto (x - \bar r)/\hat\sigmax↦(x−rˉ)/σ^, and the sign of ZZZ requires the symmetry of N(0,1)N(0,1)N(0,1), namely P[N(0,1)≥0]=1/2P[N(0,1) \ge 0] = 1/2P[N(0,1)≥0]=1/2. Once uniqueness is available, each sensitivity statement follows from these facts. The tempting shortcut of reading S=rˉ+Zσ^S = \bar r + Z\hat\sigmaS=rˉ+Zσ^ as a definition is ruled out below.

Formalization scope

  • Continuous seats. Protection levels and ZZZ are real numbers, as in the dissertation's own Gaussian example (Z=−0.675Z = -0.675Z=−0.675 at fare ratio 0.750.750.75). This differs from the first two missions of the series, which count seats in N\mathbb NN. For a continuous law P[r≥S]=P[r>S]P[r \ge S] = P[r > S]P[r≥S]=P[r>S], so the two definitions of Pˉ\bar PPˉ the dissertation uses (Eq. (5.2) and Eq. (6.2)) coincide here.
  • Gaussian law. N(rˉ,σ^2)N(\bar r, \hat\sigma^2)N(rˉ,σ^2) is Mathlib's gaussianReal rbar (σ^2), parameterised by the variance. Every theorem assumes σ^>0\hat\sigma > 0σ^>0; at σ^=0\hat\sigma = 0σ^=0 the law is a Dirac mass and (6.10) has no solution.
  • Fares. 0<f2<f10 < f_2 < f_10<f2​<f1​, so f2/f1∈(0,1)f_2/f_1 \in (0,1)f2​/f1​∈(0,1). This is the dissertation's "f2<f1f_2 < f_1f2​<f1​" together with positive fares.
  • Relational sensitivity. The sensitivity statements compare any two solutions of (6.10) under the two input values. Together with uniqueness, this is the same as monotonicity of the solution map. No function is defined by a choice operator.
  • Tail as a real number. Pˉ(S)\bar P(S)Pˉ(S) is the measure of [S,∞)[S,\infty)[S,∞) as a real number. The law is a probability measure, so nothing is truncated.
  • No trivialization. SSS is defined only by the tail equation (6.10) for N(rˉ,σ^2)N(\bar r, \hat\sigma^2)N(rˉ,σ^2), and ZZZ only by the tail equation for N(0,1)N(0,1)N(0,1). Neither is defined by the formula S=rˉ+Zσ^S = \bar r + Z\hat\sigmaS=rˉ+Zσ^, which would make Eq. (6.12) true by definition.
  • Not covered. The revenue optimality of the level defined by (6.10) belongs to the second mission. The multi-class EMSR rules (5.19)–(5.29) are not optimal for three or more classes and are not stated. The empirical analysis of Sect. 6.1 is out of scope.

Useful infrastructure, all reusable: the strict monotonicity, continuity and range of Gaussian tails; the standard normal quantile; and tail transport under affine maps. Contributions of these as separate lemmas are welcome.

Selected references

  • P. P. Belobaba, Air Travel Demand and Airline Seat Inventory Management, PhD thesis, MIT Flight Transportation Laboratory Report R87-7, 1987. (no DOI; the source PDF of this mission).
  • P. P. Belobaba, Application of a probabilistic decision model to airline seat inventory control, Operations Research 37(2):183–197, 1989. https://doi.org/10.1287/opre.37.2.183
  • K. Littlewood, Forecasting and control of passenger bookings, AGIFORS Symposium Proceedings 12, 1972; reprinted in Journal of Revenue and Pricing Management 4:111–123, 2005. https://doi.org/10.1057/palgrave.rpm.5170134
  • K. T. Talluri and G. J. van Ryzin, The Theory and Practice of Revenue Management, Springer, 2004. https://doi.org/10.1007/b139000
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Dynamics of Stochastic Approximation Algorithms 2: Under A1 and A2 the Interpolated Process Is an Asymptotic Pseudotrajectory of the Flow of FResearch Paper

Motivation

A stochastic approximation algorithm is a recursion

xn+1−xn=γn+1(F(xn)+Un+1)x_{n+1}-x_n=\gamma_{n+1}\big(F(x_n)+U_{n+1}\big)xn+1​−xn​=γn+1​(F(xn​)+Un+1​)

in Rd\mathbb R^dRd, driven by a vector field FFF, decreasing step sizes γn\gamma_nγn​ and perturbations UnU_nUn​. Robbins–Monro root finding, stochastic gradient descent, adaptive filters, learning dynamics in games (fictitious play, reinforcement learning) and urn models all have this form. The ODE method, introduced by Ljung (1977) and developed by Kushner and Clark (1978), Métivier and Priouret (1987) and Kushner and Yin (1997), studies such a recursion by comparing it with the differential equation x˙=F(x)\dot x=F(x)x˙=F(x).

Benaïm and Hirsch (1996) gave the comparison a dynamical form: the continuous-time interpolation of {xn}\{x_n\}{xn​} is an asymptotic pseudotrajectory of the flow of FFF. Proposition 4.1 of Benaïm's lecture notes (Séminaire de Probabilités XXXIII, 1999) states that deterministic comparison theorem under two assumptions: a noise condition (A1) and either bounded iterates (A2) or a Lipschitz, bounded vector field near the iterates (A2′). The notes then verify A1 almost surely for martingale noise (Propositions 4.2 and 4.4) and use the asymptotic pseudotrajectory property to describe limit sets, attractors and nonconvergence.

Setting

Let F:Rd→RdF:\mathbb R^d\to\mathbb R^dF:Rd→Rd be continuous. It is globally integrable if through every point there is exactly one integral curve y:R→Rdy:\mathbb R\to\mathbb R^dy:R→Rd, y˙=F(y)\dot y=F(y)y˙​=F(y); the flow Φt(p)\Phi_t(p)Φt​(p) is the value at time ttt of the integral curve through ppp.

The step sizes satisfy γn≥0\gamma_n\ge0γn​≥0, ∑nγn=∞\sum_n\gamma_n=\infty∑n​γn​=∞ and γn→0\gamma_n\to0γn​→0. Set τ0=0\tau_0=0τ0​=0, τn=∑i=1nγi\tau_n=\sum_{i=1}^n\gamma_iτn​=∑i=1n​γi​, and m(t)=sup⁡{k≥0:τk≤t}m(t)=\sup\{k\ge0:\tau_k\le t\}m(t)=sup{k≥0:τk​≤t}. The affine interpolated process X:R+→RdX:\mathbb R_+\to\mathbb R^dX:R+​→Rd and the piecewise constant processes X‾,U‾,γˉ\overline X,\overline U,\bar\gammaX,U,γˉ​ are, for 0≤s<γn+10\le s<\gamma_{n+1}0≤s<γn+1​,

X(τn+s)=xn+s xn+1−xnγn+1,X‾(τn+s)=xn,U‾(τn+s)=Un+1,γˉ(τn+s)=γn+1.X(\tau_n+s)=x_n+s\,\frac{x_{n+1}-x_n}{\gamma_{n+1}},\qquad \overline X(\tau_n+s)=x_n,\quad \overline U(\tau_n+s)=U_{n+1},\quad \bar\gamma(\tau_n+s)=\gamma_{n+1}.X(τn​+s)=xn​+sγn+1​xn+1​−xn​​,X(τn​+s)=xn​,U(τn​+s)=Un+1​,γˉ​(τn​+s)=γn+1​.

The noise enters through

Δ(t,T)=sup⁡0≤h≤T∥∫tt+hU‾(s) ds∥.\Delta(t,T)=\sup_{0\le h\le T}\Big\|\int_t^{t+h}\overline U(s)\,ds\Big\| .Δ(t,T)=0≤h≤Tsup​​∫tt+h​U(s)ds​.
  • A1: for every T>0T>0T>0, sup⁡{∥∑i=nk−1γi+1Ui+1∥:n<k≤m(τn+T)}→0\sup\{\|\sum_{i=n}^{k-1}\gamma_{i+1}U_{i+1}\|:n<k\le m(\tau_n+T)\}\to0sup{∥∑i=nk−1​γi+1​Ui+1​∥:n<k≤m(τn​+T)}→0 as n→∞n\to\inftyn→∞; equivalently Δ(t,T)→0\Delta(t,T)\to0Δ(t,T)→0 as t→∞t\to\inftyt→∞.
  • A2: sup⁡n∥xn∥<∞\sup_n\|x_n\|<\inftysupn​∥xn​∥<∞.
  • A2′: FFF is Lipschitz and bounded on a neighbourhood of {xn}\{x_n\}{xn​}.

A continuous X:R+→RdX:\mathbb R_+\to\mathbb R^dX:R+​→Rd is an asymptotic pseudotrajectory of Φ\PhiΦ if for every T>0T>0T>0

lim⁡t→∞sup⁡0≤h≤T∥X(t+h)−Φh(X(t))∥=0.\lim_{t\to\infty}\sup_{0\le h\le T}\big\|X(t+h)-\Phi_h(X(t))\big\|=0 .t→∞lim​0≤h≤Tsup​​X(t+h)−Φh​(X(t))​=0.

Formalization targets

Goal: Proposition 4.1

F continuous, globally integrable,A1,A2 or A2′⟹X is an asymptotic pseudotrajectory of Φ.F\ \text{continuous, globally integrable},\quad \text{A1},\quad \text{A2 or A2}'\quad\Longrightarrow\quad X\ \text{is an asymptotic pseudotrajectory of}\ \Phi .F continuous, globally integrable,A1,A2 or A2′⟹X is an asymptotic pseudotrajectory of Φ.

No rate and no constant appear; the statement holds under either alternative.

Milestones

  1. Eq. (9): X(t)−X(0)=∫0t[F(X‾(s))+U‾(s)] dsX(t)-X(0)=\int_0^t[F(\overline X(s))+\overline U(s)]\,dsX(t)−X(0)=∫0t​[F(X(s))+U(s)]ds.
  2. A1: the discrete and the continuous forms of A1 are equivalent, for each T>0T>0T>0.
  3. Theorem 3.2: for a flow on a metric space and a continuous XXX with relatively compact image, XXX is an asymptotic pseudotrajectory iff XXX is uniformly continuous and every limit point of the translates Θt(X)\Theta^t(X)Θt(X) in C0(R,M)C^0(\mathbb R,M)C0(R,M) is a trajectory of the flow; both imply that {Θt(X)}\{\Theta^t(X)\}{Θt(X)} is relatively compact.
  4. Comparison of XXX and X‾\overline XX (p. 13): if ∥F(xn)∥≤K\|F(x_n)\|\le K∥F(xn​)∥≤K, then for ttt large, sup⁡t≤u≤t+T∥X(u)−X‾(u)∥≤2Δ(t−1,T+1)+sup⁡t≤u≤t+TKγˉ(u)\sup_{t\le u\le t+T}\|X(u)-\overline X(u)\|\le2\Delta(t-1,T+1)+\sup_{t\le u\le t+T}K\bar\gamma(u)supt≤u≤t+T​∥X(u)−X(u)∥≤2Δ(t−1,T+1)+supt≤u≤t+T​Kγˉ​(u).
  5. Estimate (11): under A1 and A2′, for ttt large,
sup⁡0≤h≤T∥X(t+h)−Φh(X(t))∥≤C(T)[Δ(t−1,T+1)+sup⁡t≤s≤t+Tγˉ(s)],\sup_{0\le h\le T}\|X(t+h)-\Phi_h(X(t))\|\le C(T)\Big[\Delta(t-1,T+1)+\sup_{t\le s\le t+T}\bar\gamma(s)\Big],0≤h≤Tsup​∥X(t+h)−Φh​(X(t))∥≤C(T)[Δ(t−1,T+1)+t≤s≤t+Tsup​γˉ​(s)],

with C(T)C(T)C(T) depending only on TTT and on FFF (through its Lipschitz constant and bound on the neighbourhood).

Significance

Proposition 4.1 separates the dynamics of a stochastic approximation algorithm from its noise. Any noise condition implying A1 almost surely (Propositions 4.2 and 4.4 of the notes for LqL^qLq-bounded and subgaussian martingale differences) combines with it to give: almost every sample path, after interpolation, is an asymptotic pseudotrajectory of x˙=F(x)\dot x=F(x)x˙=F(x). The limit set theorem (Theorem 5.7: limit sets are internally chain transitive), the Lyapunov-function criterion (Proposition 6.4) and the attractor results (Section 7) then apply path by path. Estimate (11) gives the quantitative version used for rates.

The result is proved in the notes, building on Benaïm and Hirsch (1996). No machine-checked proof of it, or of the asymptotic pseudotrajectory framework, is known to exist. A formal proof would supply a checked bridge between discrete recursions with step sizes and flows of vector fields, which every ODE-method convergence proof crosses.

Difficulty

The obvious argument compares XXX directly with the flow by Gronwall's inequality. It needs FFF Lipschitz along both the interpolated path and the flow line, which holds under A2′ but not under A2, where FFF is only continuous and solutions are unique without any Lipschitz bound. Under A2 the comparison must go through compactness instead: equicontinuity of the translates, identification of every limit point as an integral curve, and uniqueness of integral curves. The last step is where global integrability is used, and it cannot be replaced by a quantitative estimate.

Under A2′ the iterates may be unbounded, so no compactness is available, and the path and the flow line must be kept inside the region where FFF is controlled for the whole window [t,t+T][t,t+T][t,t+T].

Formalization scope

  • Space Rd\mathbb R^dRd is EuclideanSpace ℝ (Fin d); time is ℝ≥0 for the pseudotrajectory and ℝ inside integrals. Sequences are ℕ → · with the paper's indices; γ0\gamma_0γ0​ and U0U_0U0​ are unused.
  • m(t)m(t)m(t) is the largest kkk with τk≤t\tau_k\le tτk​≤t, so the divisor γm(t)+1\gamma_{m(t)+1}γm(t)+1​ is positive even when some steps vanish.
  • Limits are written with ε\varepsilonε; the suprema that remain (Δ\DeltaΔ, sup⁡γˉ\sup\bar\gammasupγˉ​) are over bounded nonempty sets, and U‾\overline UU is a step function with finitely many pieces on bounded intervals, so no integral or supremum takes a default value.
  • The flow of FFF is a function satisfying the integral-curve property, together with global integrability (existence and uniqueness of integral curves on R\mathbb RR); continuity of the flow is not assumed.
  • A2′ is read with a uniform neighbourhood: FFF is Lipschitz and bounded on {y:dist⁡(y,{xn})<r}\{y:\operatorname{dist}(y,\{x_n\})<r\}{y:dist(y,{xn​})<r} for some r>0r>0r>0. Under the reading "some open set containing {xn}\{x_n\}{xn​}" the proposition fails for unbounded iterates.
  • Theorem 3.2 is stated for flows on C0(R,M)C^0(\mathbb R,M)C0(R,M) (compact-open topology); for semiflows with the convention Φp(t)=p\Phi^p(t)=pΦp(t)=p for t<0t<0t<0, the implication (i)⇒(ii) is false as printed.

Trivializing formalizations are ruled out: the goal keeps both alternatives A2 and A2′ (neither a global Lipschitz condition nor bounded iterates is assumed in place of the disjunction), XXX is the explicit piecewise affine interpolation rather than any curve with the desired property, and the constant in (11) is fixed before the sequences, so it cannot depend on the run.

A complete development needs Gronwall's inequality (in Mathlib), Arzelà–Ascoli on C0(R,M)C^0(\mathbb R,M)C0(R,M), continuous dependence of solutions on initial data under uniqueness (Kamke's theorem, not in Mathlib), and interval integrals of step functions. The asymptotic pseudotrajectory definitions and Theorem 3.2 are reusable for the other missions on these notes. Proofs of individual milestones are welcome; Eq. (9) and the comparison of XXX and X‾\overline XX are the natural entry points.

Selected references

  • M. Benaïm, Dynamics of stochastic approximation algorithms, Séminaire de Probabilités XXXIII, Lecture Notes in Math. 1709, Springer, 1999, pp. 1–68. https://doi.org/10.1007/BFb0096509
  • M. Benaïm and M. W. Hirsch, Asymptotic pseudotrajectories and chain recurrent flows, with applications, J. Dynam. Differential Equations 8 (1996), 141–176. https://doi.org/10.1007/BF02218617
  • M. Métivier and P. Priouret, Théorèmes de convergence presque sûre pour une classe d'algorithmes stochastiques à pas décroissant, Probab. Theory Related Fields 74 (1987), 403–428. https://doi.org/10.1007/BF00699098
  • H. J. Kushner and G. G. Yin, Stochastic Approximation Algorithms and Applications, Springer, 1997. https://doi.org/10.1007/978-1-4899-2696-8
  • L. Ljung, Analysis of recursive stochastic algorithms, IEEE Trans. Automat. Control 22 (1977), 551–575. https://doi.org/10.1109/TAC.1977.1101561
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Dynamics of Stochastic Approximation Algorithms 1: Limit Sets of Precompact Asymptotic Pseudotrajectories Are Internally Chain TransitiveResearch Paper

Motivation

A stochastic approximation algorithm updates an estimate by small noisy steps, xn+1−xn=γn+1(F(xn)+Un+1)x_{n+1}-x_n=\gamma_{n+1}(F(x_n)+U_{n+1})xn+1​−xn​=γn+1​(F(xn​)+Un+1​), with step sizes γn→0\gamma_n\to0γn​→0 and noise UnU_nUn​. Such recursions underlie stochastic gradient descent, adaptive control, reinforcement learning (Q-learning, temporal-difference methods) and learning in games (fictitious play, reinforcement models). The ODE method compares the long-run behaviour of the algorithm with that of the ordinary differential equation x˙=F(x)\dot x=F(x)x˙=F(x). Classical versions of this comparison (Ljung 1977, Kushner and Clark 1978) assume the ODE has a globally asymptotically stable equilibrium, or a Lyapunov function, and cannot describe algorithms whose ODE has periodic orbits, heteroclinic cycles or chaotic sets.

Benaïm and Hirsch (1996) replaced these special assumptions by a single dynamical statement: the interpolated algorithm is an asymptotic pseudotrajectory of the flow of FFF, and the limit set of every precompact asymptotic pseudotrajectory is internally chain transitive. This mission formalizes that limit set theorem as it is presented in Michel Benaïm's lecture notes Dynamics of Stochastic Approximation Algorithms (Séminaire de Probabilités XXXIII, 1999).

Timeline. Bowen (1975) and Conley (1978) introduced (δ,T)(\delta,T)(δ,T)-pseudo-orbits and chain recurrence, and Conley proved that the chain recurrent set of a flow on a compact space is internally chain recurrent. Benaïm (1996, SIAM J. Control Optim.) related limit sets of stochastic approximation processes to the chain recurrence of the ODE; Benaïm and Hirsch (1996) introduced asymptotic pseudotrajectories for semiflows on metric spaces and proved the limit set theorem in the form formalized here. The 1999 notes give a self-contained proof through the translation semiflow on a space of curves.

Setting

Let (M,d)(M,d)(M,d) be a metric space. A semiflow Φ\PhiΦ on MMM is a continuous map R+×M→M\mathbb R_+\times M\to MR+​×M→M, (t,x)↦Φt(x)(t,x)\mapsto\Phi_t(x)(t,x)↦Φt​(x), with Φ0=Id\Phi_0=\mathrm{Id}Φ0​=Id and Φt+s=Φt∘Φs\Phi_{t+s}=\Phi_t\circ\Phi_sΦt+s​=Φt​∘Φs​. A set AAA is invariant if Φt(A)=A\Phi_t(A)=AΦt​(A)=A for every t≥0t\ge0t≥0; then Φ∣A\Phi|AΦ∣A denotes the restricted semiflow on AAA.

A continuous curve X:R+→MX:\mathbb R_+\to MX:R+​→M is an asymptotic pseudotrajectory of Φ\PhiΦ if

lim⁡t→∞sup⁡0≤h≤Td(X(t+h),Φh(X(t)))=0for every T>0,\lim_{t\to\infty}\sup_{0\le h\le T}d\big(X(t+h),\Phi_h(X(t))\big)=0\quad\text{for every }T>0,t→∞lim​0≤h≤Tsup​d(X(t+h),Φh​(X(t)))=0for every T>0,

and it is precompact if X(R+)X(\mathbb R_+)X(R+​) has compact closure. Its limit set is L(X)=⋂t≥0X([t,∞))‾L(X)=\bigcap_{t\ge0}\overline{X([t,\infty))}L(X)=⋂t≥0​X([t,∞))​.

For δ>0\delta>0δ>0, T>0T>0T>0, a (δ,T)(\delta,T)(δ,T)-pseudo-orbit from aaa to bbb consists of k≥1k\ge1k≥1 partial trajectories, given by points y0,…,yk−1y_0,\dots,y_{k-1}y0​,…,yk−1​ (and an endpoint yky_kyk​) and times t0,…,tk−1≥Tt_0,\dots,t_{k-1}\ge Tt0​,…,tk−1​≥T with d(y0,a)<δd(y_0,a)<\deltad(y0​,a)<δ, d(Φtj(yj),yj+1)<δd(\Phi_{t_j}(y_j),y_{j+1})<\deltad(Φtj​​(yj​),yj+1​)<δ for j<kj<kj<k, and yk=by_k=byk​=b. One writes a↪ba\hookrightarrow ba↪b if such pseudo-orbits exist for all δ,T>0\delta,T>0δ,T>0. A nonempty compact invariant set Λ\LambdaΛ is internally chain transitive if a↪ba\hookrightarrow ba↪b for the restricted semiflow Φ∣Λ\Phi|\LambdaΦ∣Λ for all a,b∈Λa,b\in\Lambdaa,b∈Λ, so that all yiy_iyi​ lie in Λ\LambdaΛ; it is internally chain recurrent if a↪aa\hookrightarrow aa↪a for Φ∣Λ\Phi|\LambdaΦ∣Λ for every a∈Λa\in\Lambdaa∈Λ. An attractor is a nonempty compact invariant set AAA with a neighbourhood WWW such that dist⁡(Φtx,A)→0\operatorname{dist}(\Phi_tx,A)\to0dist(Φt​x,A)→0 uniformly in x∈Wx\in Wx∈W.

Formalization targets

Goal: Theorem 5.7 (i)

For every semiflow Φ\PhiΦ on a metric space MMM and every precompact asymptotic pseudotrajectory XXX of Φ\PhiΦ,

L(X) is internally chain transitive.L(X)\ \text{is internally chain transitive.}L(X) is internally chain transitive.

Milestones (in the order of the proof)

  • Lemma 3.1. XXX is an asymptotic pseudotrajectory iff d(Θt(X),Φ^∘Θt(X))→0d(\Theta^t(X),\hat\Phi\circ\Theta^t(X))\to0d(Θt(X),Φ^∘Θt(X))→0, where Θ\ThetaΘ is the translation semiflow on C0(R+,M)C^0(\mathbb R_+,M)C0(R+​,M) and Φ^(Y)=ΦY(0)\hat\Phi(Y)=\Phi^{Y(0)}Φ^(Y)=ΦY(0).
  • Theorem 3.2. For precompact continuous XXX: XXX is an asymptotic pseudotrajectory iff XXX is uniformly continuous and every limit point of Θt(X)\Theta^{t}(X)Θt(X), t→∞t\to\inftyt→∞, is a trajectory of Φ\PhiΦ; and then {Θt(X)}t≥0\{\Theta^t(X)\}_{t\ge0}{Θt(X)}t≥0​ is relatively compact.
  • Lemma 5.2. A nonempty open UUU with compact closure and ΦT(U‾)⊂U\Phi_T(\overline U)\subset UΦT​(U)⊂U for some T>0T>0T>0 contains an attractor whose basin contains U‾\overline UU.
  • Proposition 5.3. For nonempty Λ\LambdaΛ: internally chain transitive   ⟺  \iff⟺ connected and internally chain recurrent   ⟺  \iff⟺ compact, invariant and Φ∣Λ\Phi|\LambdaΦ∣Λ has no proper attractor.
  • Theorem 5.5. On a nonempty compact MMM, the chain recurrent set R(Φ)R(\Phi)R(Φ) is internally chain recurrent.
  • Corollary 5.6. If γ+(x)‾\overline{\gamma^+(x)}γ+(x)​ is compact, then ω(x)\omega(x)ω(x) is internally chain transitive.

Significance

The result. Theorem 5.7 (i) is the bridge between probability and dynamics in the ODE method. Once a stochastic approximation process is shown to be an asymptotic pseudotrajectory (missions 2 to 4 of this series do that under martingale-noise conditions), every statement about its limit points becomes a statement about internally chain transitive sets of the ODE: convergence to equilibria when a Lyapunov function exists (Proposition 6.4), convergence to attractors with positive probability (Theorem 7.3), and the analysis of learning dynamics in games. The theorem is sharp in the sense that every internally chain transitive set is a limit set of some asymptotic pseudotrajectory (Theorem 5.7 (ii), proved in Benaïm and Hirsch 1996 and not part of this mission).

Formalizing it. The result is proved in the literature; it is not formalized. Mathlib has semiflows (Flow), omega limit sets and the compact-open topology, but no pseudo-orbits, chain recurrence, Conley's theory of attractors, or asymptotic pseudotrajectories. This mission produces that layer for semiflows on general metric spaces, which is reusable for any later formalization of the ODE method, of Conley theory, or of learning in games.

Difficulty

The obvious approach follows XXX from a point a∈L(X)a\in L(X)a∈L(X) to a point b∈L(X)b\in L(X)b∈L(X): XXX returns near aaa and near bbb infinitely often, and on windows of length TTT it is close to a trajectory, so concatenating windows gives a pseudo-orbit. The pseudo-orbit obtained this way has its points on the curve XXX, not in L(X)L(X)L(X); this only shows that L(X)L(X)L(X) is chain transitive for Φ\PhiΦ on MMM, a strictly weaker property. Producing pseudo-orbits whose points lie in L(X)L(X)L(X) itself is the central difficulty, and it is where precompactness of XXX is used. Invariance Φt(L(X))=L(X)\Phi_t(L(X))=L(X)Φt​(L(X))=L(X), with equality, also needs a compactness argument, since a semiflow is not invertible.

Formalization scope

A semiflow is Mathlib's Flow ℝ≥0 M on a [MetricSpace M]; MMM is arbitrary, with no compactness, completeness or local compactness. Time is ℝ≥0. Curves are functions ℝ≥0 → M; continuity is part of being an asymptotic pseudotrajectory, and precompactness is IsCompact (closure (Set.range X)). Invariance is equality Φt(A)=A\Phi_t(A)=AΦt​(A)=A. Internally chain recurrent and internally chain transitive sets are nonempty by definition, and their pseudo-orbits are those of the restricted semiflow on the subtype Λ\LambdaΛ, so every point of the pseudo-orbit lies in Λ\LambdaΛ. Attractors converge uniformly on a neighbourhood. Lemma 3.1 and Theorem 3.2 are stated on C0(R+,M)C^0(\mathbb R_+,M)C0(R+​,M) (C(ℝ≥0, M), compact-open topology) with the half-line distance; the notes write C0(R,M)C^0(\mathbb R,M)C0(R,M), but with the convention Φp(t)=p\Phi^p(t)=pΦp(t)=p for t<0t<0t<0 that version fails for semiflows (a periodic trajectory is a counterexample), and the notes themselves describe asymptotic pseudotrajectories as points of C0(R+,M)C^0(\mathbb R_+,M)C0(R+​,M).

Ruled out: pseudo-orbits with no trajectory piece (k=0k=0k=0), pseudo-orbits allowed to leave L(X)L(X)L(X), invariance as mere inclusion Φt(A)⊂A\Phi_t(A)\subset AΦt​(A)⊂A, and any compactness assumption on MMM. Each of these makes the goal weaker than the theorem of the notes.

A complete development needs: elementary properties of pseudo-orbits (concatenation, continuity estimates), Arzelà–Ascoli on C(ℝ≥0, M), Conley's attractor construction, and the conjugacy between Φ\PhiΦ and the translation semiflow on SΦS_\PhiSΦ​. Proofs of the milestones, alternative direct proofs of the goal (Benaïm 1996), and reusable lemmas about chain recurrence for Flow are all welcome.

Selected references

  • M. Benaïm, Dynamics of stochastic approximation algorithms, Séminaire de Probabilités XXXIII, Lecture Notes in Math. 1709, Springer, 1999, pp. 1–68. https://doi.org/10.1007/BFb0096509
  • M. Benaïm and M. W. Hirsch, Asymptotic pseudotrajectories and chain recurrent flows, with applications, J. Dynam. Differential Equations 8 (1996), 141–176. https://doi.org/10.1007/BF02218617
  • M. Benaïm, A dynamical system approach to stochastic approximations, SIAM J. Control Optim. 34 (1996), 437–472. https://doi.org/10.1137/S0363012993253534
  • C. Conley, Isolated Invariant Sets and the Morse Index, CBMS Regional Conference Series in Mathematics 38, AMS, 1978. https://doi.org/10.1090/cbms/038
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