By Rance Cleaveland (auth.), Jos C. M. Baeten, Sjouke Mauw (eds.)

This ebook constitutes the court cases of the tenth foreign convention on Concurrency idea, CONCUR'99, held in Eindhoven, The Netherlands in August 1999.

The 32 revised complete papers offered including 4 invited contributions have been chosen from a complete of ninety one submissions. The papers deal with all components of semantics, logics, and verification strategies for concurrent platforms, specifically method algebras, Petri nets, event-structures, real-time platforms, hybrid platforms, stochastic structures, decidability, model-checking, verification, refinement, time period and graph rewriting, dispensed programming, good judgment constraint programming, typing platforms, and so on.

**Read or Download CONCUR’99 Concurrency Theory: 10th International Conference Eindhoven, The Netherlands, August 24—27, 1999 Proceedings PDF**

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**Additional info for CONCUR’99 Concurrency Theory: 10th International Conference Eindhoven, The Netherlands, August 24—27, 1999 Proceedings**

**Example text**

Such distances are, in principle, linear in the counter value, and the constraint of the mentioned equality yields the linear belts. Periodicity (inside the belts and on the background) then follows from some simple observations. Remark. As mentioned above, a complexity bound can be achieved by a more detailed analysis; nevertheless, it was not done in [13]. 3 Undecidability We certainly cannot expect bisimulation equivalence to be decidable for a class of graphs representing systems which are able to faithfully model universal devices, in particular Minsky machines [21], which are simple straight-line programs which operate on nonnegative counters.

Pn−1 , pn, q0 , q1 , . . , qn−1, qn }. The set of variables is V = { Z, 0, 1 }. For each machine instruction X : cb := cb +1; goto Xj we have the productions i p Z → pj (b|Z) and i q Z → qj (b|Z). – For each machine instruction X : if cb = 0 then goto Xj else cb := cb −1; goto Xk we have the productions p b → pk d p Z → pj Z z p b → qj b d q Z → qj Z z q b → pj b q b → qk z z – We have the one final production h pn Z → pn The MSA graph reflects the (computation of the) machine M in the following sense.

By a colouring with colours from a finite set C we mean a function c : N × N → C. Given a one-counter machine M (that is, the respective collection of PDA productions) with control state set Q, by a colouring c related to M we mean any colouring arising as the product c = p,q∈Q c(p,q) where c(p,q) : N×N → {black, white}. Such a colouring c represents the relation Rc on the set of vertices of the respective graph as follows: p(m) Rc q(n) iff c(p,q) (m, n)=black. We distinguish the colouring cM representing bisimulation equivalence: cM (p,q) cM = p,q∈Q M where cM (p,q) (i, j) = black iff p(i) ∼ q(j) and c(p,q) (i, j) = white iff p(i) ∼ q(j).