By Zhou Chaochen (auth.), Armando M. Haeberer (eds.)
AMAST’s objective is to boost knowledge of algebraic and logical method as a part of the elemental foundation of software program expertise. Ten years and 7 meetings after the beginning of the AMAST stream, i think we're achieving this. The stream has propagated through the global, assembling many enthusiastic experts who've participated not just within the meetings, that are now annual, but additionally within the innumerable different actions that AMAST promotes and helps. we're now dealing with the 7th foreign convention on Algebraic method and software program expertise (AMAST’98). the former conferences have been held in Iowa urban, united states (1989 and 1991), in Enschede, The Netherlands (1993), in Montreal, Canada (1995), in Munich, Germany (1996), and in Sydney, Australia (1997). This time it's Brazil’s flip, in a really precise a part of this colourful kingdom – Amazonia. hence, “if we have now performed extra it really is by means of status at the shoulders of giants.” the trouble all started via Teodor Rus, Arthur Fleck, and William A. Kirk at AMAST’89 was once consolidated in AMAST'91 by way of Teodor Rus, Maurice Nivat, Charles Rattray, and Giuseppe Scollo. Then got here modular development of the construction, splendidly conducted via Giuseppe Scollo, Vangalur Alagar, Martin Wirsing, and Michael Johnson, as software Chairs of the AMAST meetings held among 1993 and 1997.
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Extra info for Algebraic Methodology and Software Technology: 7th International Conference, AMAST’98 Amazonia, Brazil, January 4–8, 1999 Proceedings
E. Uribe. STeP: Deductive-algorithmic verification of reactive and real-time systems. In R. A. Henzinger, editors, Proc. 8th Intl. Conference on Computer Aided Verification, vol. 1102 of LNCS, pages 415–418. Springer-Verlag, July 1996. R. M. L. L. Dill, and J. Hwang. Symbolic model checking: 1020 states and beyond. Information and Computation, 98(2):142–170, 1992. S. Bjørner. Integrating Decision Procedures for Temporal Verification. PhD thesis, Computer Science Department, Stanford University, November 1998.
Figure 2 shows a GVD for the program loops of Figure 1. The only initial node is n0 . M is a constant, where we assume M > 1. Encapsulation conventions, based on those of Statecharts [Har87], are used to make diagrams more succinct. Nodes n3 and n4 are part of a compound node which, together with n1 and n2 , is part of a larger compound node. An assertion that labels a Visual Abstractions for Temporal Verification 35 compound node is added, as a conjunct, to its subnodes. Edges leaving (entering) a compound node are interpreted as leaving (entering) all of its subnodes.
Thus, once the above verification conditions are proved, we can conclude that any safety property of Ψ also holds for S. To preserve progress properties, a second set of verification conditions ensures that every computation of the system can follow an accepting path in the diagram, that is, can always eventually remain in an accepting SCS. Thus, if an SCS S is not accepting, we must show that computations can always leave S, or cannot stay in S forever. For an SCS S, a tail (S)-computation is a system computation that has a corresponding path π in the diagram such that inf(π) = S.
Algebraic Methodology and Software Technology: 7th International Conference, AMAST’98 Amazonia, Brazil, January 4–8, 1999 Proceedings by Zhou Chaochen (auth.), Armando M. Haeberer (eds.)