# Games for Exchanging Information

## Presentation on theme: "Games for Exchanging Information"— Presentation transcript:

Games for Exchanging Information
Gillat Kol Joint work with Moni Naor

Our Goal Design secret sharing schemes that work assuming players are rational

Talk Plan Introduction Our Contributions Background Related Work
Scheme Construction Impossibility Solution Concept

Cryptographic vs. Game Theoretic Settings
Cryptography: Players are either arbitrarily malicious or totally honest. Game Theory: Players are rational trying to maximize their payoff functions. ui(σ) is i’s payoff when following the protocol σ=(σ1,..,σn). We assume: Players are rational: Prefer to learn the secret above all else. Secondly, prefer to learn alone. Players are computationally unbounded. Communicating via a simultaneous broadcast channel (SBC) - no rushing.

MetaDef: m-out-of-n RSS scheme. Shares assignment algorithm for the dealer (as in the usual crypto setting). Game Theoretically stable (e.g., Nash equilibrium) reconstruction protocol for the players. Def: σ is a Nash Equilibrium no player can gain by deviating from his strategy, assuming that all the others are following theirs:  i σ’i: ui(σi,σ-i) ≥ ui(σ’i,σ-i) Each player’s strategy is a best response to the strategies of the others.

Shamir’s scheme is not RSS. Recall that to reconstruct players reveal their shares. For p=m (p = num of participants): Not Nash Higher payoff for keeping silence. For p>m: “Unstable” Nash No player, on its own, can prevent others from learning. Silence is never worse revealing, but sometimes better. Main Problem: Players deviate in the last round of the protocol, since they no longer fear future punishment. Solution: Players shouldn't be able to identify the last round. Protocols are unbounded and allow players to learn w.p. 1.

Talk Plan Introduction Our Contributions Background Related Work
Scheme Construction Impossibility Solution Concept

Previous Works Previous results required one of the followings:
The dealer’s involvement in the reconstruction [HT04]. Cryptographic tools [GK06, LT06, ADGH06]. Requires computational assumptions and bounded players. Achieves only approximated Nash. Different (stronger) hardware assumptions: Private channels [GK06, ADGH06] + [BGW88]. Requires ≥ 4 players. Envelopes and ballots boxes [LMPS04, LMS05, ILM05]. Solve a more general problem (SFE given any utilities). Achieve stronger solution concepts (coalitions).

Talk Plan Introduction Our Contributions Background Related Work
Scheme Construction Impossibility Solution Concept

Our Contribution Solution Concept: What is a good RSS scheme?
Previous criterion does not rule out all unstable protocols. Previous crypto protocols are susceptible to backward induction (BI). Impossibility: There is no “reasonable” Nash RSS with SBC taking shares from finite sets. Constructing an RSS with SBC and finite shares taken from infinite sets. Satisfies stronger solution concepts (strict Nash, no BI). Unbounded players, No computational assumptions. Can remove the simultaneity assumption and get approximated Nash.

Talk Plan Introduction Our Contributions Background Related Work
Scheme Construction Impossibility Solution Concept

The Scheme Construction
Present a buggy 2-out-of-2 RSS. Fix it. Analyze it. Generalize to m-out-of-n for all 2≤m≤n. Remove the simultaneity assumption.

Uses a parameters  (TBD), S is secrets set. Select the shares sizes: ℓ1, ℓ2 = ℓ1+d where ℓ1,d ~ G() (Geometric distribution). Select secrets list: random list L of ℓ2 secrets from S s.t. the ℓ1th secret is s. Assign shares: choose player randomly, give him L, and the other L’ = L(1,...,ℓ1-1). Players do not know whether their shares are short or long. Shares are taken from unbounded sets. Long Player Short Player L L’ 2 5 1 3 6 2 5 1 3 ℓ1=5 4 ℓ2=7

Player (share): Broadcast the next secret in your list. Keep silent if your list ended. If the other broadcasted a false value, abort. If only a single player broadcasts: the last value broadcasted is s. Long Player Short Player L L’ Iteration 1 2 5 1 3 6 2 5 1 3 Iteration 2 Iteration 3 Iteration 4 Iteration 5 4 quiet

Bug 1: Identifying the Last Iteration
Long Player Short Player Problem: The short player identifies the last iteration when his list ends. May broadcast a fictitious secret. Solution: Divide iterations into stages: #stages in each iteration is chosen ~ G(). Players broadcast only during the last stage. Players get #stages for cells in their list. The short player does not know #stages of the last iteration. 4 2 8 5 1 3 6 7 4 2 8 5 1 3 Secrets #Stages

Bug 2: Guessing the Secret
Problem: If some secret appears a lot in the list, w.h.p it is the real secret. Solution: Mask every secret in the list using a random mask Dealer gives each player a share of every mask. Shares of the tth mask are broadcasted by the players during iteration t-1. L 4 4

Problem: Players may broadcast fictitious information. Solution: Dealer equip players with authentication information. Now it works…

Strict Nash Equilibrium
Def: σ is a Strict Nash Equilibrium every player looses when deviating from his strategy, assuming that all the others are following theirs:  i σ’i: ui(σi,σ-i) > ui(σ’i,σ-i) A player’s strategy is a strict, unique best response. Strict Nash Nash Example: Shamir’s reconstruction is not a strict Nash.

Protocol Analysis Recall: Pr[ current iteration is the last ] = .
Theorem: For a sufficiently small , the scheme is a strict Nash with expected number of rounds 1/2. Proof: By deviating players risk early termination.  must depend on the payoffs. The higher the payoff for learning alone vs. learning with others, the smaller  is.

Talk Plan Introduction Our Contributions Background Related Work
Scheme Construction Impossibility Solution Concept

Revelation Point Theorem: There is no Nash RSS with shares taken from finite sets without a revelation point (RP). Def (Informal): RP of a reconstruction protocol is a point its execution for which: Some players do not know the secret. At any point after it, the secret is known to all. Protocols with RP are “unreasonable”. Players always learn after RP  Should not reveal info. Players learn right after RP  Someone does reveal info. Example: Shamir’s reconstruction has RP before the first round. Strict Nash Nash with no RP

Transcripts Trees A transcript of σ is a possible sequence of messages m = (m1,…,mℓ) broadcasted by the players during rounds 1..ℓ while following σ. We view transcripts as vertices of a Transcripts Tree. Def: RP of σ is a vertex in σ’s transcript tree that has children, but no grandchildren.

Claim: Children are Correlated
Assume for simplicity that σ allows players to learn together. Claim: For every transcript p of σ, one of the following holds: Players always learn after the next round. Players never learn after the next round. (independently of their random tapes) Impossible: all learn p no-one learns

Claim Proof: Hybrid Argument
Assume that the input is x, and that players learn given r = (r1,..,rn), but don’t learn given r’ = (r1’,..,rn’). Define the hybrid ri = (r’1,..,r’i,ri+1,..,rn). Hybrid Argument: i s.t. given shares x, all learn given ri, but no-one learns given ri+1. Players other than i act the same given ri and ri+1  i learns given ri+1 since he learns given ri  Contradiction!

Theorem Proof: Inductive Argument
mk m2 p revelation point x1 x2 xk Theorem: There is no Nash RSS with shares taken from finite sets without an RP. Proof: Construct a path leading to the RP. C(m) = Set of possible shares x for which players do not know s when reaching m. m0 = empty transcript. Take x1C(m0). m, a descendent of m0, s.t. given x1, players learn s after m, but not before.

Theorem Proof: Inductive argument
Let p be m’s parent. If p has no grandchildren, p is an RP. Otherwise, let m1 be a child of p with children. Using the claim: Players learn after m given shares x1  They learn after m1 given x1. C(m0)  C(m1) Recall: C(m) = Set of possible shares for which players do not know s when reaching m. Use the same argument to find m0, m1, m2… s.t. C(m0)  C(m1)  C(m2)… Since the shares sets are finite, the sequence is finite. The finiteness of the shares set is used!

Talk Plan Introduction Our Contributions Background Related Work
Scheme Construction Impossibility Solution Concept On Iterated Admissibility On Backward Induction

IA was used as a criterion distinguishing good from bad schemes in [HT04, GK06, LT06, ADGH06]. Def: Strategy σi is (weakly) dominated if there exists a strategy i that is never worse than σi but sometimes strictly better (1) σ-i: ui(i , σ-i) ≥ ui(σi, σ-i ) (2) σ-i: ui(i, σ-i) > ui(σi, σ-i) Example: Shamir’s reconstruction is dominated by the silence strategy. Def: A strategies is Iterated Admissible (IA) if it survives iterated deletion of dominated strategies.

IA doesn’t rule out all bad behaviors
No finite strategy is stable  The game played is infinite. talk-oncei = Shamir’s reconstruction in the infinite game. i reveals his share in round 1 and then broadcasts  forever. Theorem: talk-oncei is IA. Proof: i trying to dominate talk-oncei there is a “savior” σ-i. Example: For i = silence, σ-i = others keep silent in round 1, and reveal their shares in round 2 iff i talked in round 1. In general: σ-i waits to see if player i follows talk-oncei, then rewards or punishes him accordingly. Strict Nash IA Nash

Talk Plan Introduction Our Contributions Background Related Work
Scheme Construction Impossibility Solution Concept On Iterated Admissibility On Backward Induction

Backward Induction Previous crypto solutions [LT06, ADGH06]:
Run the crypto SFE [GMW87] in every iteration. Have small expected running time, but are unbounded. Observation: Those protocols are essentially bounded by K iterations (K = #of keys for the SFE of iteration 1). Problem: Backward Induction The BI process: Players deviate in iteration K since it is the last, causing K-1 to be last. The same holds for K-1,K-2,..,1. BI causes the instability in exponential events to be amplified. Solution: Should require the protocol to still be stable after any history. Our protocol satisfies this property! (as is every exact Nash)

Concluding Remarks Game Theory and Cryptography
Common areas of interest (e.g. simulating mediators). Different assumptions and models. By combining techniques / ideas we gain new insights. We look for RSS schemes using SBC. Solution concept is an issue. The infiniteness of the shares sets is a necessary and sufficient condition for an exact solution.

References [ADGH06] Abraham, Dolev, Gonen, and Halpern. Robust Mechanisms for Rational Secret Sharing and Multiparty Computation. PODC 2006. [BGW88] Ben-Or, Goldwasser, Wigderson. Completeness Theorems for Non-Cryptographic Fault-Tolerant Distributed Computation STOC 1988. [GK06] Gordon and Katz. Rational Secret Sharing, Revisited. SCN 2006. [GMW87] Goldreich, Micali, and Wigderson. How to Play any Mental Game. STOC 1987. [HT04] Halpern and Teague. Rational Secret Sharing and Multiparty Computation. STOC 2004. [ILM05] Izmalkov, Micali, and Lepinski. Rational Secure Computation and Ideal Mechanism Design. FOCS 2005. [LT06] Lysyanskaya and Triandopoulos. Rationality and Adversarial Behavior in Multi-Party Computation. CRYPTO 2006. [LMPS04] Lepinski, Micali, Peikert, and Shelat. Completely Fair SFE and Coalition-Safe Cheap Talk. PODC 2004. [LMS05] Lepinski, Micali, and Shelat. Collusion-Free Protocols. STOC 2005.