Download Advances in Cryptology — CRYPTO 2002: 22nd Annual by Sean Murphy, Matthew J.B. Robshaw (auth.), Moti Yung (eds.) PDF

By Sean Murphy, Matthew J.B. Robshaw (auth.), Moti Yung (eds.)

ISBN-10: 354044050X

ISBN-13: 9783540440505

Crypto 2002, the twenty second Annual Crypto convention, was once backed by means of IACR, the foreign organization for Cryptologic examine, in cooperation with the IEEE computing device Society Technical Committee on safeguard and privateness and the pc technology division of the college of California at Santa Barbara. it truly is released as Vol. 2442 of the Lecture Notes in machine technology (LNCS) of Springer Verlag. be aware that 2002, 22 and 2442 are all palindromes... (Don’t nod!) Theconferencereceived175submissions,ofwhich40wereaccepted;twos- missionsweremergedintoasinglepaper,yieldingthetotalof39papersaccepted for presentation within the technical software of the convention. during this court cases quantity you are going to ?nd the revised types of the 39 papers that have been offered on the convention. The submissions symbolize the present nation of labor within the cryptographic neighborhood around the globe, masking all parts of cryptologic examine. actually, many high quality works (that absolutely might be released in other places) couldn't be approved. this can be as a result of the aggressive nature of the convention and the tough job of choosing a application. I desire to thank the authors of all submitted papers. certainly, it's the authors of all papers who've made this convention attainable, whether or no longer their papers have been authorised. The convention software used to be additionally immensely bene?ted through plenary talks.

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Additional resources for Advances in Cryptology — CRYPTO 2002: 22nd Annual International Cryptology Conference Santa Barbara, California, USA, August 18–22, 2002 Proceedings

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M [ − 1], of n bits each. The ciphertext is defined by: C[0] = EK1 (r) N [0] = C[0] for i = 1 to − 1 do N [i] = EK1 (M [i] ⊕ N [i − 1]) C[i] = N [i] ⊕ Si end for C[ ] = EK1 (checksum ⊕ N [l − 1]) ⊕ S0 , where checksum = This is summarized in figure 2. l−1 i=1 M [i]. Blockwise-Adaptive Attackers 25 To decrypt a ciphertext C, the receiver parses it into + 1 blocks denoted by (C[0], C[1], . . , C[ ]) and computes r = DK1 (C[0]). He can then recover the mask values (S0 , . . , S −1 ) with the help of the secret boolean matrix M .

Step 5 if the equality Cb [1] ⊕ Cb [2] = C [1] ⊕ C [2] holds, the attacker guesses the bit b = 0, else he guesses b = 1. We claim that the attacker always guesses correctly the bit b. Indeed, suppose that message M0 has been encrypted, meaning that b = 0. Then we get: Cb [1] ⊕ Cb [2] = EK (M0 [1] ⊕ Cb [0]) ⊕ S1 ⊕EK (M0 [2] ⊕ EK (M0 [1] ⊕ Cb [0])) ⊕ S2 26 Antoine Joux, Gwena¨elle Martinet, and Fr´ed´eric Valette Furthermore, we have: C [1] ⊕ C [2] = EK (M [1] ⊕ C [0]) ⊕ S1 ⊕EK (M [2] ⊕ EK (M [1] ⊕ C [0]) ⊕ S2 = EK (C [0] ⊕ M0 [1] ⊕ Cb [0] ⊕ C [0]) ⊕ S1 ⊕EK (M [2] ⊕ EK (C [0] ⊕ M0 [1] ⊕ Cb [0] ⊕ C [0]) ⊕ S2 = EK (M0 [1] ⊕ Cb [0]) ⊕ S1 ⊕EK (M0 [2] ⊕ EK (M0 [1] ⊕ Cb [0])) ⊕ S2 Now, we have proved above that S1 ⊕ S2 = S1 ⊕ S2 .

M [n]) by randomly choosing w and u and by computing the ciphertext (T1 , C[1], C[2], . . , C[n], T2 ) as follows: T1 = Epk (w, u) k1 = H1 (w, T1 ) C[1] = Ek1 (M [1]) ki = Hi (ki−1 , M [i − 1], w) C[i] = Eki (M [i]) T2 = F (kn , M [n], w) This is summarized in figure 1. 2 Attack on GEM–1 The security of GEM–1 is proved in [5] in the random oracle model, assuming that Epk is “reasonably” secure, even when EK is quite weak (a simple XOR 22 Antoine Joux, Gwena¨elle Martinet, and Fr´ed´eric Valette w ❄ u ✲ E ❄ T1 ❄ H1 k✲ 1 ✻ M [1] M [n] ❄ ❄ E ❄❄❄ H2 k✲ 2 ❄ C[1] ❄❄❄ Hn k✲ n E ❄ C[n] ❄❄❄ F ❄ T2 Fig.

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