Download Advances in Cryptology – CRYPTO 2010: 30th Annual Cryptology by Zvika Brakerski, Shafi Goldwasser (auth.), Tal Rabin (eds.) PDF

By Zvika Brakerski, Shafi Goldwasser (auth.), Tal Rabin (eds.)

This booklet constitutes the refereed complaints of the thirtieth Annual foreign Cryptology convention, CRYPTO 2010, held in Santa Barbara, CA, united states in August 2010, co-located with CHES 2010, the workshop on Cryptographic and Embedded platforms. The 39 revised complete papers provided have been rigorously reviewed and chosen from 203 submissions. Addressing all present foundational, theoretical and learn facets of cryptology, cryptography, and cryptanalysis in addition to complex purposes, the papers are equipped in topical sections on leakage, lattice, homomorphic encryption, conception and functions, key trade, OAEP/RSA, CCA, assaults, composition, computation delegation and obfuscation, multiparty computation, pseudorandomness, and quantum.

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Advances in Cryptology – CRYPTO 2010: 30th Annual Cryptology Conference, Santa Barbara, CA, USA, August 15-19, 2010. Proceedings

This e-book constitutes the refereed court cases of the thirtieth Annual overseas Cryptology convention, CRYPTO 2010, held in Santa Barbara, CA, united states in August 2010, co-located with CHES 2010, the workshop on Cryptographic and Embedded structures. The 39 revised complete papers awarded have been rigorously reviewed and chosen from 203 submissions.

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Fj ] denote the first j rounds of Ψr . For any j, 1 ≤ j ≤ r, we let E(j, Yj ) = Ψj−1 (Yj ), that is, the input Z such that the intermediate value after j rounds in the computation Ψr (Z) is Yj . It will be convenient to define E (j, Yj ) = {Z, Ψr (Z), g(R1 ), . . , g(Rr )} where (R0 , . . , Rr+1 ) ← μ(Ψr , Z). We show that def Claim. E (1, YL YR ) can be computed (with probability δ) making k+1 forward queries to Ψr . Leakage-Resilient Pseudorandom Functions 35 def Proof (of Claim). As Z = E(1, YL YR ) is YR f1 (YR )⊕YL , to get Z it is sufficient def to learn C = f1 (YR ).

We say R[i, j + 1] (resp. R[i, j − 1]) is “freshly generated” if the ith query is a forward (resp. inverse) query where R[i, j] is fresh in the sense that R[i, j] = R[k, j] for all k < j (and thus fj has not been invoked on R[i, j] before). We say that for this sequence of queries the 5-XOR condition holds, if some freshly generated value can be expressed as the bitwise XOR of 5 previously computed round function inputs. 1 from [12]). Let Ψr be any r round Feistel network. 38s/2 forward/inverse queries to Ψr the 5-XOR condition does not hold, then there is no collision on the input to the jth round function for any j ∈ [s, r − s].

If A will provoke the 5XOR condition (which holds with prob. ), and A guessed which fresh query will satisfy this condition for the first time (with happens with prob 1/(q · r)), then A will output 1. Thus in this case A outputs 1 with prob. /(q · r). By definition, the gap /q · r − q 5 r5 /(5! · 2n ) between those two probabilities is A advantage in breaking the L-resilience of F. Proof (of Theorem 3). Consider an adversary A of size s against the L -resilience of Ψr as specified in Definition 2.

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