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By Cynthia Dwork (auth.), Michele Bugliesi, Bart Preneel, Vladimiro Sassone, Ingo Wegener (eds.)

The two-volume set LNCS 4051 and LNCS 4052 constitutes the refereed court cases of the thirty third overseas Colloquium on Automata, Languages and Programming, ICALP 2006, held in Venice, Italy, in July 2006.

This is quantity II (LNCS 4052) comprising 2 invited papers and a couple of extra convention tracks with 24 papers each one - conscientiously chosen from various submissions - concentrating on algorithms, automata, complexity and video games in addition to on safeguard and cryptography beginning respectively. The papers are prepared in topical sections on zero-knowledge and signatures, cryptographic protocols, secrecy and protocol research, cryptographic promitives, bounded garage and quantum versions, foundations, multi-party protocols, video games, semantics, automata, versions, equations, and logics.

Volume I (LNCS 4051) offers sixty one revised complete papers including 1 invited lecture that have been rigorously reviewed and chosen from 230 submissions. these papers have a different concentrate on algorithms, automata, complexity and video games and are geared up in topical sections on graph thought, quantum computing, randomness, formal languages, approximation algorithms, graph algorithms, algor

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Extra resources for Automata, Languages and Programming: 33rd International Colloquium, ICALP 2006, Venice, Italy, July 10-14, 2006, Proceedings, Part II

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The other way of combining patterns is to tensor them. Two patterns P1 and P2 may be tensored if V1 ∩ V2 = ∅. Again one can always meet this condition by renaming qubits in a way that these sets are made disjoint. Definition 3. The tensor pattern P1 ⊗ P2 is defined as: — V = V1 ∪ V2 , I = I1 ∪ I2 , and O = O1 ∪ O2 , — commands are concatenated. In contrast to the composition case, all unions involved here are disjoint. Therefore commands from distinct patterns freely commute, since they apply to disjoint qubits, and when we say that commands have to be concatenated, this is only for definiteness.

These protocols are enabled by the efficient constructions of new commitment schemes that are simultaneously independent (and thus non-malleable) and mercurial. – Finally we define various notions of non-malleability for ZKS protocols. We then ask if the DIO theorem (that independence implies non-malleability for 36 R. Gennaro and S. Micali commitments) holds for ZKS protocols as well. Surprisingly the answer is not that simple. We show under which conditions independent ZKS protocols are also non-malleable.

Completeness can be verified by inspection. The hiding property follows by the perfect honest-verifier zero-knowledge property of the Σ-protocols and the proof system of SimDlogC. Assume by contradiction that an s-concurrent malicious sender sen succeeds in computing two decommitments to different messages of the same commitment. This means that sen outputs two different messages m, m and two string z, z such that for the same message a sent during the second round of the protocol, both transcripts (a, m, z) and (a, m , z ) are accepting.

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