Henri Gilbert's Advances in Cryptology - EUROCRYPT 2010: 29th Annual PDF

By Henri Gilbert

ISBN-10: 3642131891

ISBN-13: 9783642131899

This publication constitutes the refereed court cases of the twenty ninth Annual foreign convention at the conception and purposes of Cryptographic thoughts, EUROCRYPT 2010, hung on the French Riviera, in May/June 2010. The 33 revised complete papers offered including 1 invited lecture have been rigorously reviewed and chosen from 188 submissions. The papers handle all present foundational, theoretical and examine features of cryptology, cryptography, and cryptanalysis in addition to complex functions. The papers are geared up in topical sections on cryptosystems; obfuscation and part channel safeguard; 2-party protocols; cryptanalysis; computerized instruments and formal equipment; versions and proofs; multiparty protocols; hash and MAC; and foundational primitives.

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The polynomial applied to the input ciphertexts over the integers). This is no longer true when using the size-reduction optimization, because of the additional modular reduction steps. ” In principle, it is plausible that evaluating one circuit would yield a ciphertext with small enough noise to be decrypted, while evaluating another circuit for the same polynomial will produce a ciphertext with too much noise. 2 to the optimized scheme, one would have to take into account not only the degree of the polynomial implementing the decryption process but also the particular circuit that implements this polynomial.

Moreover, for every ciphertext (c∗ , z) that is generated by evaluating a permitted polynomial, it holds that si zi is within 1/4 of an integer. Proof. Fix public and secret keys, generated with respect to security parameter Θ λ, with {yi }Θ i=1 the rational numbers in the public key and {si }i=1 the secretkey bits. Recall that the yi ’s were chosen so that [ i si yi ]2 = (1/p) − Δp with |Δp | ≤ 2−κ . Fix a permitted polynomial P (x1 , . . , xt ) ∈ PE , an arithmetic circuit C that computes P , and t ciphertexts {ci }ti=1 that encrypt the inputs to C, and denote c∗ = Evaluate(pk, C, c1 , .

The solver B begins by constructing a public $ key for the scheme. B draws τ + 1 samples x0 , . . , xτ ← Dγ,ρ (p). It relabels so that x0 is the largest. It restarts unless x0 is odd. B then outputs a public key pk = x0 , x1 , . . , xτ . Clearly, if rp (x0 ) happens to be even then the distribution induced on the public key is identical to that of the scheme. Step 2: A subroutine for high-accuracy LSB predictor. Next, B produces a sequence of integers, and attempts to recover p by utilizing A to learn the leastsignificant bit of the quotients of these integers with respect to p.

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Advances in Cryptology - EUROCRYPT 2010: 29th Annual International Conference on the Theory and Applications of Cryptographic Techniques, French Riviera, ... Computer Science / Security and Cryptology) by Henri Gilbert


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