Modular coinduction up-to for higher-order languages via first-order transition systems

In our previous paper [1], a new model of a Labeled Transition System (LTS)-type implementation was proposed. In ordinary LTSs, transitions are labeled by actions; therefore, they can be called LTSs of actions. The new model is an LTS of observations; in this model, observations and test actions (buttons) are used instead of actions. This model generalizes many testing semantics that are based on the LTS of actions but use additional observations (refusals, ready sets, etc.). Moreover, systems with priority, which are not described by the LTS of actions, are simulated uniformly. In the present paper, we develop this approach by focusing on the composition of systems. The point is that, on observation traces, one cannot define a composition with respect to which a composition of LTSs would possess the property of additivity: the set of traces of a composition of LTSs coincides with the set of all pairwise compositions of traces of LTS operands. This is explained by the fact that an observation in a composition state is not calculated based on observations in states-operands. In this paper, we propose an approach that eliminates this drawback. To this end, we label the transitions of LTSs by symbols (events) that, on the one hand, can be composed to guarantee the property of additivity, and, on the other hand, can be used to generate observations under testing: a transition by an event gives rise to an observation related to this event. This model is called an LTS of events. In this paper, we define (1) a transformation of an LTS of events into an LTS of observations to conform with the principles of our previous paper [1]; (2) a composition of LTSs of events; (3) a composition of specifications that preserves conformance: a composition of conformal implementations is conformal to a composition of specifications; and (4) a uniform simulation of LTSs of actions in terms of the LTSs of events, which allows one to consider an implementation in any interaction semantics admissible for LTSs of actions. In this case, a composition of LTSs of events obtained as a result of simulation of the original LTSs of actions is equivalent to the LTS of events obtained as a result of simulation of the composition of these LTSs of actions.

When a Petri net is synthesised from a labelled transition system, it is frequently desirable that certain additional constraints are fulfilled. For example, in circuit design, one is often interested in constructing safe Petri nets. Targeting such subclasses of Petri nets is not necessarily computationally more efficient than targeting the whole class. For example, targeting safe nets is known to be NP-complete while targeting the full class of place/transition nets is polynomial, in the size of the transition system. In this paper, several classes of Petri nets are examined, and their suitability for being targeted through efficient synthesis from labelled transition systems is studied and assessed. The focus is on choice-free Petri nets and some of their subclasses. It is described how they can be synthesised efficiently from persistent transition systems, summarising and streamlining in tutorial style some of the authors’ and their groups’ work over the past few years.

The main contribution of this work is a fast algorithm for checking whether a labelled transition system (LTS) is operationally deterministic. Operational determinism is a condition on the LTS designed to capture the notion of “deterministic behaviour” without ruling out invisible actions and divergence, and without strictly devoting oneself to any single process-algebraic semantics. Indeed, we show that in the case of operationally deterministic LTSs, all divergence-sensitive equivalences between divergence-sensitive branching bisimilarity and trace + divergence trace equivalence collapse to the same equivalence. The running time of the algorithm is linear except a term that, roughly speaking, grows as slowly as Ackermann's function grows quickly. If the original LTS is operationally deterministic, the algorithm produces as a by-product a structurally deterministic LTS that is divergence-sensitive branching bisimilar to the original one. This LTS can be minimised like a deterministic finite automaton. The overall approach is so cheap that it makes almost always sense to first try it and revert to a semantics-specific reduction or minimisation algorithm only if the LTS proves operationally nondeterministic.

In this chapter, I try to formulate swarms as labelled transition systems with the same set of labels (events or actions): direction, splitting, fusion, repelling. Then I show that these labelled transition systems can implement Kolmogorov-Uspensky machines, but with a low accuracy because of emergent patterns which occur if we have many states of appropriate transition system. Then I propose a p-adic arithmetic and logic to formalize emergent patterns of swarms. To sum up, I offer a general logical approach to swarm intelligence.

Comparing operational models of name-passing process calculi

Bisimulation up-to enhances the coinductive proof method for bisimilarity, providing efficient proof techniques for checking properties of different kinds of systems. We prove the soundness of such techniques in a fibrational setting, building on the seminal work of Hermida and Jacobs. This allows us to systematically obtain up-to techniques not only for bisimilarity but for a large class of coinductive predicates modeled as coalgebras. The fact that bisimulations up to context can be safely used in any language specified by GSOS rules can also be seen as an instance of our framework, using the well-known observation by Turi and Plotkin that such languages form bialgebras. In the second part of the paper, we provide a new categorical treatment of weak bisimilarity on labeled transition systems and we prove the soundness of up-to context for weak bisimulations of systems specified by cool rule formats, as defined by Bloom to ensure congruence of weak bisimilarity. The weak transition systems obtained from such cool rules give rise to lax bialgebras, rather than to bialgebras. Hence, to reach our goal, we extend the categorical framework developed in the first part to an ordered setting.

In this paper, we investigate several equivalence relations for probabilistic labeled transition systems: bisimulation equivalence, readiness equivalence, failure equivalence, trace equivalence, maximal trace equivalence and finite trace equivalence. We formally prove the inclusions (equalities) among these equivalences. We also show that readiness, failure, trace, maximum trace and finite trace equivalences for finite probabilistic labeled transition systems are decidable in polynomial time. This should be contrasted with the PSPACE completeness of the same equivalences for classical labeled transition systems. Moreover, we derive an efficient polynomial time algorithm for deciding bisimulation equivalence for finite probabilistic labeled transition systems. The special case of initiated probabilistic transition systems will be considered. We show that the isomorphism problem for finite initiated labeled probabilistic transition systems is NC(1) equivalent to graph isomorphism.

When a Petri net system of some class is synthesised from a labelled transition system, it may be interesting to derive structural properties of the corresponding reachability graphs and to use them in a pre-synthesis phase in order to quickly reject inadequate transition systems, and provide fruitful error messages. The same is true for simultaneous syntheses problems. This was exploited for the synthesis of choice-free nets for instance, for which several interesting properties have been derived. We exhibit here a new property for this class, and analyse if this gets us closer to a full characterisation of choice-free synthesizable transition systems.

Pre-synthesis of Petri nets based on prime cycles and distance paths

A possible approach to studying behavioural equivalences in labelled transition systems is that of characterizing them in terms of homomorphic transformations. This characterization permits relying on algebraic techniques for proving systems properties and reduces equivalence checking of two systems to studying the relationships among the elements of their structures. Different algebraic characterizations of bisimulation-based equivalences in terms of particular transition systems homomorphisms have been proposed in the literature. Here we show, by an example, that trace-based equivalences are not locally characterizable and thus that the above results cannot be extended to these equivalences. However, similar results can be obtained if we confine ourselves to restricted classes of transition systems. Here, the algebraic characterizations of three well known decorated-trace equivalences (ready trace, ready and failure equivalence) for tree-like structures are presented.

Models for name-passing processes: interleaving and causal

A model checker is an automatic tool that traverses a specific structure (normally a Kripke structure referred as the modelM) to check the satisfaction of some (temporal) logical propertyf. This is formally stated asM⊧f. For some formal notations, the modelMof a specificationS(written in a formal languageL) can be described as a labelled transition system (LTS). Specifically, it is not clear in general how usual tools such as SPIN, FDR, PAT, etc., create the LTS representation from a given process. Although one expects the coherence of the LTS generation with the semantics ofL, it is completely hidden inside the model checker itself. In this paper we show how to create a model checker forL, using a development approach based on its operational semantics. We use a systematic semantics embedding and the formal modeling using logic programming and analysis (FORMULA) framework to this end. We illustrate our strategy considering the formal language COMPASS modelling language (CML)—a new language that was based on CSP, VDM and the refinement calculus proposed for modelling and analysis of systems of systems. As FORMULA is based on satisfiability modulo theories solving, our model checker can handle communications and predicates involving data with infinite domains by building and manipulating a symbolic LTS. This goes beyond the capabilities of traditional CSP model checkers such as FDR and PAT. Moreover, we show how to reduce time and space complexities by simple semantic modifications in the embedding. This allows a more semantics-preserving tuning. Finally, we show a real implementation of our model checker in an integrated development platform for CML and its practical use on an industrial case study.

A Study On The Potential Active Names of π-Agents

Categories for synchrony and asynchrony

We investigate an operational model of concurrent systems, called automata with concurrency relations. These are labelled transition systems \(\mathcal{A}\) in which the event set is endowed with a collection of binary concurrency relations which indicate when two events, in a particular state of the automaton, commute. This model generalizes asynchronous transition systems, and as in trace theory we obtain, through a permutation equivalence for computation sequences of \(\mathcal{A}\), an induced domain \((\mathcal{D}(\mathcal{A}), \leqslant )\). Here, we construct a categorical equivalence between a large category of (‘cancellative’) automata with concurrency relations and the associated domains. We show that each cancellative automaton can be reduced to a minimal cancellative automaton generating, up to isomorphism, the same domain. Furthermore, when fixing the event set, this minimal automaton is unique.KeywordsTransition SystemLabel Transition SystemComputation SequenceLambda CalculusTrace TheoryThese keywords were added by machine and not by the authors. This process is experimental and the keywords may be updated as the learning algorithm improves.