By Mihir Bellare, Ran Canetti, Hugo Krawczyk (auth.), Neal Koblitz (eds.)

Crypto '96, the 16th Annual Crypto convention, is backed via the foreign organization for Cryptologic learn (IACR), in cooperation with the IEEE laptop Society Technical Committee on safety and P- vacy and the pc technological know-how division of the collage of California at Santa Barbara (UCSB). It occurs at UCSB from August 18 to 22, 1996. the final Chair, Richard Graveman, is answerable for neighborhood association and registration. The clinical application was once geared up by way of the 16-member software C- mittee. We thought of one hundred fifteen papers. (An extra 15 submissions needed to be summarily rejected due to lateness or significant noncompliance with the c- ditions within the demand Papers.) of those, 30 have been approved for presentation. additionally, there'll be 5 invited talks via Ernest Brickell. Andrew Clark, Whitfield Diffie, Ronald Rivest, and Cliff Stoll. A Rump consultation may be chaired through Stuart Haber. those court cases include the revised models of the 30 contributed talks. least 3 com- The submitted model of every paper used to be tested by way of at mittee participants and/or outdoor specialists, and their reviews have been taken under consideration within the revisions. even if, the authors (and no longer the committee) endure complete accountability for the content material in their papers.

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Extra resources for Advances in Cryptology — CRYPTO ’96: 16th Annual International Cryptology Conference Santa Barbara, California, USA August 18–22, 1996 Proceedings

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E Notc. If a9’+qV is not a linear traiisforrriatiori of (iq +q then X = 271 with a very high probability. It is not c-lcar if X t’aii be # n , Y 2n arid < 212 and what cryptanalysis caii be doiie if this occui MIIP-3 Similarly, frorrl thc. sable to compute all the cquatmionsC y i , i k x i t j y k + . . bles are generated by only about o ( n ) polynomials of dcgrec t,wo. The fact. tions. Tf we denote by P I , .. hese polynomials ( A = O ( n ) and X = 371 very often), then instead of the public key we c m write (without changing the security) ahout p equat>ions like t,his, { L 2: 3 n : I, x k=l j = l (Most of thcsc.

If a9’+qV is not a linear traiisforrriatiori of (iq +q then X = 271 with a very high probability. It is not c-lcar if X t’aii be # n , Y 2n arid < 212 and what cryptanalysis caii be doiie if this occui MIIP-3 Similarly, frorrl thc. sable to compute all the cquatmionsC y i , i k x i t j y k + . . bles are generated by only about o ( n ) polynomials of dcgrec t,wo. The fact. tions. Tf we denote by P I , .. hese polynomials ( A = O ( n ) and X = 371 very often), then instead of the public key we c m write (without changing the security) ahout p equat>ions like t,his, { L 2: 3 n : I, x k=l j = l (Most of thcsc.

St, and can easilly be iniplcrnented i n sriiartcards with low power (without arithmetic coproccssor). Moreover we will see now t h a t the public key length can be very riioderat,e for t,wo reasons: 1. We can have a v i i l u ~n which is not t,oo l a r g c (for example n = 32) if we have a valiic y which is not, t,oo small. 2. Moreovcr, t8hepublic kpy can be w r i l , k i i with polynoniials of total degree two (inst,ead of t,lircc) as we will s w now! (l7nfortunately this idea will help us t o a t h c k t,hc schrmes as we will see i n Part, 2).

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