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Distinguishing extended finite state machine configurations using predicate abstraction
Journal of Software Engineering Research and Developmentvolume 4, Article number: 1 (2016)
Abstract
Background
Extended Finite State Machines (EFSMs) provide a powerful model for the derivation of functional tests for software systems and protocols. Many EFSM based testing problems, such as mutation testing, fault diagnosis, and test derivation involve the derivation of input sequences that distinguish configurations of a given EFSM specification.
Method and Results
In this paper, a method is proposed for the derivation of a distinguishing sequence for two explicitly given or symbolically represented, possibly infinite, sets of EFSM configurations using a corresponding FSM abstraction that is derived based on finite sets of predicates and parameterized inputs. An abstraction function that maps configurations and transitions of the EFSM specification to corresponding abstract states and transitions of the abstraction FSM is proposed. Properties of the abstraction are established along with a discussion on a proper selection of the sets of predicates and parameterized inputs used while deriving an FSM abstraction. If no distinguishing sequence is found for the current FSM abstraction then a refined abstraction is constructed by extending the sets of predicates and parameterized inputs. Simple heuristics for the selection of additional predicates are discussed and application examples are provided.
Conclusions
The work can be applied in various domains such as EFSMbased test derivation, mutation testing, and fault diagnosis.
Introduction, background and related work
Model based test derivation is now widely used for deriving functional tests for various systems including communication protocols and other reactive systems. Several approaches have been proposed for deriving conformance tests when the system specification is represented by an Extended Finite State Machine (EFSM) (Bochmann & Petrenko 1994; Bourhfir et al. 2001; Cavalli et al. 2003; Ramalingom et al. 2003; ElFakih et al. 2003; Petrenko et al. 2004; ElFakih et al. 2008; Sugeta et al. 2004; Jia & Harman 2011; Keum et al. 2006; Wong et al. 2009). The EFSM model extends the classical (Mealy) Finite State Machine (FSM) model with input and output parameters, context variables, operations (or update functions) and predicates (or guards) defined over context variables and input parameters. The EFSM model is used as the underlying model for a number of popular specification techniques, such as Statecharts (Harel & Naamad 1996), SDL (ITUT 1994) and UML (OMG 2002). EFSM based related testing problems, test derivation approaches, and applications domains are given in several papers such as (Bochmann & Petrenko 1994; Bourhfir et al. 2001; Cavalli et al. 2003; Ramalingom et al. 2003; ElFakih et al. 2003; Petrenko et al. 2004; ElFakih et al. 2008; Sugeta et al. 2004; Jia & Harman 2011; Keum et al. 2006; Wong et al. 2009). Furthermore, an extension of the EFSM model to specify and test timed systems is considered in (Merayo et al. 2008).
In one way or another, almost all related work for EFSM based test derivation relies on distinguishing two or more configurations of the specification EFSM. A configuration of an EFSM is a pair of a (control) state and a valuation of the context variables (called context).
In this paper, we consider the problem of deriving input sequences that distinguish two, possibly infinite, sets of configurations of the specification EFSM. A sequence defined over (parameterized) inputs of an EFSM is a distinguishing sequence for two sets of configurations if this sequence is defined for each configuration and the output responses to this sequence for each pair of configurations of different sets are different.
Our work can be used in various EFSM based testing problems. For instance, in test derivation, checking if a transition of the blackbox Implementation Under Test (IUT) transfers wrongly from a current state involves distinguishing a next reference configuration from some other configurations of the specification EFSM as described in (Bochmann & Petrenko 1994; Bourhfir et al. 2001; Ramalingom et al. 2003; Petrenko et al. 2004; ElFakih et al. 2008). The set of configurations that one would like to distinguish from a given configuration is called a “blacklist” of “suspicious configurations” in (Petrenko et al. 2004). The work can also be applied to EFSM based mutation testing to distinguish the initial configuration of a given specification machine from the initial configuration of a mutant EFSM derived from the specification, with respect to some selected types of faults as described in (Bochmann & Petrenko 1994). Further, if the initial configuration is unknown or the reset input is not reliable then the work can be applied for distinguishing the set of possible initial configurations of the specification machine and the set of configurations of their possible mutants. Another application is the fault localization using approaches similar to those in (ElFakih et al. 2003; Ghedamsi et al. 1993). In this case, given an EFSM specification, an initial test suite derived against this specification and a faulty EFSM implementation under test (IUT), a set of possible socalled candidates can be derived using the given specification and observed behavior of the IUT to the test suite. Afterwards, the method given in this paper can be used for deriving distinguishing sequences, called diagnostic tests, that when applied to the IUT can eliminate the candidates that do not behave as the IUT and thus, eventually locate the faulty candidate with a behavior similar to that of the given IUT.
Here we summarize closely related work on distinguishability. As an EFSM can be regarded as a condensed version of an FSM, an EFSM can be unfolded to an equivalent FSM by expanding inputs and states with the values of input parameters and context variables when all the domains are finite. Thus, generally speaking, deriving a sequence that distinguishes two EFSM configurations can be done by unfolding the EFSM specification into an equivalent FSM and then deriving a distinguishing sequence for the corresponding FSM states. However, this approach is practically impossible due to the state explosion problem. Furthermore, this approach cannot be applied when the EFSM specification cannot be unfolded into an equivalent FSM since the domains of some variables and/or input parameters of the specification are infinite. Accordingly, some model checking techniques have been tailored and used for solving distinguishability problems at the EFSM level using appropriate product machines (Wang et al. 1994; Cho et al. 1991; Clatin et al. 1995; Fernandez et al. 1996; Okun et al. 2002). In all these works, a product of two machines (Petrenko et al. 2004) has been used, where one of these machines represents a given specification while the other represents a faulty IUT derived by either mutating the given specification to reveal a certain type of faults or is derived by a test engineer to satisfy a test purpose. The concept of a product machine is used and extended in (Petrenko et al. 2004) to handle distinguishing one EFSM configuration from a blacklist of several “suspicious” configurations. More precisely, in (Petrenko et al. 2004), a method is given for computing socalled configuration identification sequences that can distinguish two configurations of a given EFSM. The derivation of these sequences is done by deriving a special product EFSM, called a distinguishing machine, where for two given configurations of two EFSMs M and N, the product machine starting from the pair of given configurations contains the common and uncommon behavior, i.e. parameterized input/output sequences or traces, of M and N. In the distinguishing machine, uncommon behavior terminates at designated states with a fail component. An input sequence that takes the distinguishing machine to a fail state is a distinguishing sequence for the two initial configurations. The work can also be applied to distinguishing one configuration of a deterministic EFSM from a set of suspicious configurations of a possibly nondeterministic EFSM. However, in this case, many product machines, depending on the number of suspicious configurations, have to be constructed and this is cumbersome when the number of suspicious configurations is not small. In addition, in fact, there is a need to determine the parameterized input sequence (with input parameters values) that can be used to take the distinguishing machine into a fail state. This problem by itself is not trivial for EFSMs; a process for determining such a sequence may have to be repeated many times until an executable input sequence to a fail state is derived. Moreover, opposed to the work presented in this paper, the above listed approaches for distinguishing EFFSM configurations are based on deriving product machine(s) and cannot be applied when the set of suspicious configurations is infinite and/or symbolically described over the EFSM context variables. We note that in the context of testing from Labeled Transitions Systems, the construction of models that can treat data (or/and time) symbolically is done in several papers, see for example in (Rusu et al. 2000) and (Andrade & Machado 2013).
The work presented in this paper can be regarded as another extension to solving the distinguishability problem at the EFSM level; however, employing a different verification technique than that used by other related work, namely, predicate abstraction (Graf & Saidi 1997). This special form of abstraction was introduced by Graf and Saidi in (Graf & Saidi 1997) for constructing a finite state abstraction from a large or an infinite system using a finite set of predicates and this abstraction has been used in various verification tools to analyze software, hardware, and highlevel protocols (see e.g. (Das 2003)). Generally speaking, in many cases, the number of suspicious configurations in a blacklist can be large or even infinite; for example, testing a transfer fault requires a blacklist of at least (n – 1) suspicious configurations, where n is the number of states of the given EFSM specification. A transition of an EFSM (implementation) has a transfer fault if it transfers to a state different than the specified one. In addition, in some cases, it is necessary to distinguish not only one configuration from a set of many configurations; but two sets of many configurations. This happens, for example, in EFSM based fault diagnosis (ElFakih et al. 2003) where different types of faults are considered, such as transfer and predicate faults. Diagnosing if an IUT has a transfer or predicate fault requires in fact distinguishing two sets of configurations, namely, one for transfer faults and another for predicate faults. Furthermore, in some situations, the list of suspicious configurations may not be explicitly given, for example, it can be symbolically specified as predicates by a test engineer knowing a given test purpose. In this case, existing EFSMbased methods for distinguishing configurations cannot be applied when finite or infinite sets of configurations are described symbolically.
Predicate abstraction and our contribution: The method proposed in this paper is based on using abstraction techniques which nowadays are widely used for formal software verification (see e.g. (Graf & Saidi 1997; Bensalem et al. 1992; Clarke et al. 1994; Dams et al. 1994; Long 1993)). In general, abstraction is used as a proof technique, where a concrete, possibly infinite, system is first simplified or transformed into a finite abstract system and properties of the concrete system can be classified by examining the smaller abstract one. Thus, abstraction techniques are used as prominent approaches for addressing the state explosion problem (Graf & Saidi 1997; Bensalem et al. 1998) and correspondingly seem also to be useful for solving the problem of distinguishing large or possibly infinite sets of configurations tackled in this paper.
Here we aim at solving the distinguishability problem, for two sets of configurations, using predicate abstraction and refinement as follows: given two disjoint possibly infinite sets of configurations of a given EFSM specification where configurations of each set can be explicitly enumerated or can be symbolically specified by predicates, we first derive an FSM abstraction using a proposed abstraction function, and then show that a distinguishing sequence, called a separating sequence in (Starke 1972), derived for the corresponding sets of abstract states of the abstraction FSM (if such a sequence exists) is a distinguishing sequence for the given sets of configurations. The abstraction function maps configurations of the EFSM into abstract states of the abstraction FSM using a finite set of predicates and a finite set of selected input parameter valuations. We discuss how such sets can be derived and establish properties of the abstraction FSM and the relationship between traces of the given EFSM and its FSM abstraction. The abstraction function is derived in such a way that if a separating sequence exists for appropriate sets of states of the abstraction FSM then there is no need to run or simulate the obtained sequence at the given configurations to assess distinguishability. When there is no separating sequence for the sets of abstract states of an abstraction FSM, we refine the current FSM abstraction and try to find such a sequence using the refined abstraction. Two approaches for refining an abstraction FSM are considered, in particular, we consider predicate and input refinement. Predicate refinement is carried out by expanding the set of predicates and then deriving a refined FSM abstraction using the expanded set. Predicate refinement reduces nondeterminism in an abstraction FSM and thus, increases the chance of the existence of a separating sequence. The relationship between traces of a current abstraction FSM and its refined version is studied.
The paper is organized as follows. Section 2 describes the EFSM and FSM models. Section 3 contains the abstraction function with related propositions and Section 4 includes an algorithm for distinguishing configurations of an EFSM. Predicate refinements of an abstraction are proposed in Section 5. Section 6 discusses limitations of the proposed work and Section 7 concludes the paper.
Preliminaries
In this paper, we study the distinguishability problem for configurations of an Extended Finite State Machine (EFSM) using a corresponding abstraction Finite State Machine (FSM). Accordingly, in the following, a description of these models with related notions used in the paper is provided.
Extended FSM model
Let X and Y be finite sets of inputs and outputs, R and V be finite disjoint sets of input parameters and context variables. For x ∈ X, R _{ x } ⊆ R denotes the set of input parameters and D _{ Rx } denotes the set of valuations of the parameters over the set R _{ x }. The set D _{ V } denotes the set of context variable valuations. A context variable valuation is denoted as vector v, where v ∈ D _{ V }.
The sets R _{ x } and D _{ V } can be infinite. Definitions 1 to 4 given below are related to EFSMs and they are mostly adopted from (Petrenko et al. 2004).
Definition 1: An EFSM M over X, Y, R, V with the associated valuation domains is a pair (S, T) where S is a finite nonempty set of states, including the designated initial state, and T is the set of transitions between states in S, such that each transition t ∈ T is a tuple (s, x, P, y, up, s′), where:
s and s′ are the start and final states of the transition t,
x ∈ X is the input of transition t,
y ∈ Y is the output of transition t,
P and up are functions defined over context variables V and input parameters as follows:
P : D _{ Rx } × D _{ V } → {True (or 1), False (or 0)} is the predicate (or the guard) of the transition t,
up : D _{ Rx } × D _{ V } → D _{ V } is the context update function of transition t.
A transition can have the trivial guard that is always True; in this case, we say that the transition has no guard. An input x can have no parameters; in this case, R _{ x } = ∅, D _{ Rx } = {⊥}, and the input (x, ⊥) is simply denoted by (x) or x. If x is nonparameterized then corresponding predicates are defined only over D _{ V }.
Definition 2: A context variable valuation v ∈ D _{ V } is called a context of M. A configuration of M is a tuple (s, v) where s is a state and vector v is a context.
An EFSM operates as follows. Assume that EFSM is at a current configuration (s, v) and the machine receives an input (x, p _{ x }) such that (v, p _{ x }) satisfies the guard P of an outgoing transition t = (s, x, P, op, y, up, s′). Then the machine being at (s, v), upon receiving the input (x, p _{ x }), executes the update statements of t; produces the (parameterized) output where parameter values are provided by the output parameter function op, and moves to configuration (s′, v′), where v′ = up(p _{ x }, v). Thus, a transition can be represented as (s, v)  (x, p_{ x })/(y, p_{ y }) → (s′, v′), where op(p _{ x }, v) = (y, p _{ y }). Such a transition can also be written as ((s, v), (x, p _{ x }), (y, p _{ y }), (s′, v′)). The machine usually starts from a designated initial configuration which contains the designated initial state and initial context variable valuation.
Example 1. We illustrate the notion of an EFSM and how it operates through a simple example. Consider the EFSM M _{1} given in Fig. 1 which is defined over state set S = {1, 2}, inputs a and b, i.e. X = {a, b}, where b is nonparameterized and input a is parameterized with the integer parameter with value a.i, outputs 0 and 1, i.e. Y = {0, 1}. The set of context variables V = {z} and in this example, we assume that D _{ V } (domain of the variable z) is the set of all nonnegative integers. The set of input parameters R _{ a } and we assume that the domain D _{ Ra } (domain of the input parameter i) is the set of all nonnegative integers, D _{ Rb } = {⊥} as b is nonparameterized. Hereafter, for a parameterized input say a, we let a(0) or (a, 0) denote the fact that the machine receives the input a with the parameter value a.i = 0. The machine has four transitions. For example, it has t _{1} = (1, a, 1 ≤ a.i ≤ 4, 0, z := z + 1, 2) with states 1 and 2 as start and final states, respectively, the guard (predicate) 1 ≤ a.i ≤ 4, and variable update z: = z + 1. The machine has a transition with the guard (predicate) even(z) which is 1 (True) iff the value of context variable z is even; otherwise, the guard even(z) is 0 (False). Another transition has the guard odd(z) which equals 1 iff z is odd; otherwise, the predicate equals 0. Assume that (1, z = 0) is a current configuration of the EFSM and the machine receives a parameterized input a(i), then the machine checks the predicates of outgoing transitions from state 1 that are satisfied for the current configuration under the input a with parameter value a.i. If the received value a.i = 3, then the machine checks predicates 1 ≤ a.i ≤ 4 of t _{1} and a.i ≥ 5 of t _{2}. As 1 ≤ a.i ≤ 4 holds, transition t _{1} is executed according to the context update function z := z + 1 with output 0, and the machine moves from state 1 to the final state 2 as specified by t _{1}. In fact, the machine moves from configuration (1, z = 0) to configuration (2, z = 1).
Definition 3: An EFSM M is:

predicate complete if, for each transition t, every element in D _{ Rx } × D _{ V } evaluates to True at least one predicate of the set of all predicates guarding transitions with the same start state and input as t;

input complete if, for each pair (s, x) in S × X, there exists at least one transition leaving state s with input x;

deterministic if any two transitions outgoing from the same state with the same input have mutually exclusive predicates.
Hereafter, we consider input complete, predicate complete and deterministic EFSMs. This class of EFSMs covers almost all the known types of EFSMs studied in the context of testing (Petrenko et al. 2004).
Definition 4: Given input x and the possibly empty set D _{ Rx } of input parameter valuations, a parameterized input (or an input) is a tuple (x, p _{ x }), where p _{ x } ∈ D _{ Rx }. Recall in case R _{ x } = ∅, D _{ Rx } = {⊥}, and the input (x, ⊥) is denoted as x. A sequence of parameterized inputs is called a (parameterized) input sequence. An (parameterized) output sequence can be defined in a similar way.
Consider the machine in Fig. 1 with the set {a, b} of inputs, where a is parameterized and the domain of its input parameter D _{ Ra } is the set of all nonnegative integers and b is nonparameterized, D _{ Rb } = {⊥}. The sequence (a, 3) b b (a, 5) is an input sequence of the machine.
By definition, for a deterministic predicate and input complete EFSM M, for every state s ∈ S, input x ∈ X, (possibly empty) input parameter valuation p _{ x } ∈ D _{ Rx }, and context valuation v ∈ D _{ V }, there exists one and only one guard P defined at outgoing transitions of s under the input x, such that P(p _{ x } , v) is True. Thus, for each configuration (s, v) and each (parameterized) input (x, p _{ x }), there is only one transition from the configuration (s, v) under (x, p _{ x }) and for each (parameterized) input sequence α there exists exactly one output sequence β such that α/β is a trace at (s, v).
Definition 5: Given a parameterized input sequence that sometimes is simply called an input sequence α, configurations c of EFSM M and c′ of EFSM N are distinguishable by α if the output sequences produced by M and N at configurations c and c′ in response to α are different. The sequence α is called a sequence distinguishing c and c′.
Given the EFSM M _{1} in Fig. 1, the two configurations (2, z = 3) and (2, z = 4) are distinguishable by the input sequence (a, 1). Actually, they are distinguishable by any input sequence (a, i) with any value of i.
Definition 6: Two sets of configurations C of the EFSM M and C′ of EFSM N are distinguishable if there exists an input sequence α that distinguishes each pair (c, c′), c ∈ C and c′ ∈ C′; in this case, we say that the sequence α distinguishes sets C and C′.
Given EFSM M _{1} (Fig. 1) and the two (infinite) sets of configurations {(1, z): z is odd} and {(1, z): z is even}, any two configurations of different sets are distinguishable by the input sequence (a, 5) (a, 1). As another example, consider the sets of configurations {(s, z): z is odd} and {(s, z): z is even}, s = {1, 2}. The sequence (a, 5) (a, 1) (a, 1) distinguishes any two configurations of these two sets.
Definition 7: Given a configuration (s _{1}, v) of EFSM M, an Input/Output (I/O) sequence σ = (x _{1} , p _{ x1} )/y _{1}….. (x _{ l }, p _{ xl })/y _{ l } is a trace at configuration (s _{1}, v), written (s _{1}, v) σ >, if there exists a (s _{ l }, v _{ l }) such that σ takes the M from (s _{1}, v) to (s _{ l }, v _{ l }), written (s _{1}, v) σ  > (s _{ l }, v _{ l }). In other words, in M there exists a sequence of transitions (s _{1}, v _{1})  (x _{1} , p _{ x1} )/(y _{1}, p _{ y1})  (s _{2}, v _{2})  > (s _{2}, v _{2})  (x _{2} , p _{ x2} )/(y _{2}, p _{ y2})  (s _{3}, v _{3}) … > (s _{ l1}, v _{ l1})  (x _{ l } , p _{ xl } )/(y _{ l }, p _{ yl })  (s _{ l }, v _{ l }). The (parameterized) input projection α of a trace σ is α = σ_{↓X } = (x _{1} , p _{ x1} )…. (x _{ l } , p _{ xl } ) and the output projection of σ is the output sequence (y _{1}, p _{ y1})(y _{2}, p _{ y2}) ….. (y _{ l }, p _{ yl }).
Given EFSM M _{1} (Fig. 1), there is the sequence of transitions (1, z = 0) – b/1  (1, z = 0)  > (1, z = 0)  (a, 3)/1  (1, z = 3)  > (1, z = 3) – (a, 7)/0  (1, z = 4) at configuration (1, z = 0); thus, b/1 (a, 3)/1 (a, 7)/0 is a trace at the configuration (1, z = 0) with the input projection b (a, 3) (a, 7) and the output projection 1 1 0.
FSM model
A finite state machine (FSM) or simply a machine, is a 5tuple 〈S, s _{1}, I, O, h _{ S }〉, where S is a finite nonempty set of states with s _{1} as the initial state; I and O are finite input and output alphabets; and h _{ S } ⊆ S × I × O × S is a behavior relation. The behavior relation defines all possible transitions of the machine. Given a current state s _{ j } and an input symbol i, a 4tuple (s _{ j }, i, o, s _{ k }) ∈ h _{ S } represents a possible transition from state s _{ j } under the input i to the next state s _{ k } with the output o. A machine is deterministic if for each pair (s,i) ∈ S × I there exists at most one pair (o, s′)∈O × S such that (s, i, o, s′) ∈ h _{ S }; otherwise, the machine is nondeterministic. If for each pair (s, i) ∈ S × I there exists (o, s′) ∈ O × S such that (s, i, o, s′) ∈ h _{ S } then FSM S is said to be complete; otherwise, the machine is called partial. FSMs considered in the paper are complete but can be nondeterministic.
In a usual way, the behavior relation is extended to input sequences I* and output sequences O*. Given states s, s′ ∈ S, an input sequence α = i _{1} i _{2}…i _{ k } ∈ I* and an output sequence β = o _{1} o _{2}…o _{ k } ∈ O*, there is a transition (s, α, β, s′)∈h _{ S } if there exist states s _{1} = s, s _{2}, …, s _{ k }, s _{ k+1} = s′ such that (s _{ i }, i _{ i }, o _{ i }, s _{ i+1}) ∈ h _{ S }, i = 1, …, k. In this case, the input sequence α is a defined input sequence at state s. Given states s and s′, the defined input sequence α can take (or simply takes) the FSM S from state s to state s′ if there exists an output sequence β such that (s, α, β, s′) ∈ h _{ S } . The set out(s, α) denotes the set of all output sequences (responses) that the FSM S can produce at state s in response to a defined input sequence α, i.e. out _{ S }(s, α) = {β : ∃ s′∈S [(s, α, β, s′) ∈ h _{ S }]}. The pair α/β, β ∈ out _{ S }(s, α), is an Input/Output (I/O) sequence (or a trace) at state s. Given states s and s′, the I/O sequence α/β can take (or simply takes) the FSM S from state s to state s′ if (s, α, β, s′)∈h _{ S } . Given an I/O sequence σ = α/β, the input projection of σ, written σ _{↓I}, is α. Given two complete FSMs S = 〈S, I, O, h _{ S }〉 and R = 〈R, I, O, h _{ R }〉, state s of S and state r of R are nonseparable if for each input sequence α ∈ I* it holds that out _{ S }(s, α) ∩ out _{ R }(r, α) ≠ ∅, otherwise, states s and r are separable. For separable states s and r, there exists an input sequence α ∈ I* such that out _{ S }(s, α) ∩ out _{ R }(r, α) = ∅, i.e., the sets of output responses of FSMs S and R at states s and r to the input sequence α are disjoint. In this case, α is a separating sequence of states s and r or simply α separates s and r. Given complete FSMs S = 〈S, I, O, h 〉 and R = 〈R, I, O, h 〉, subsets S′ ⊆ S and R′ ⊆ R are separable if there exists an input sequence α that separates each pair (s, r), s ∈ S′ and r′ ∈ R′. The sequence α is a separating sequence for the sets S′ and R′.
Consider FSM M _{2} ^{D} in Fig. 5 with the set {a, b} of inputs and the set {0, 1} of outputs. The two states (1, B, P) and (1, B, ~P) are separable by the input sequence a a. The two sets of states {(0, B, P), (0, B, ~P)} and {(0, ~B, P), (0, ~B, ~P)} are separable by the sequence a a a, as in response to a a a at any state of the former set the FSM produces the output sequence 0 0 0 while at any state of the latter set the FSM produces the output sequence 0 0 1. We note that states (0, ~B, P) and (0, ~B, ~P) are nonseparable and the reader can intuitively check that by observing that under the input a the FSM reaches the same state (1, B, P) from both states producing the same output 0 and under the input b states are reachable from each other with the same output 1.
A method for distinguishing configurations of an EFSM using an FSM abstraction
In this section, the problem of distinguishing two disjoint sets of EFSM configurations is introduced and an FSM predicate abstraction function that maps an EFSM into an abstract FSM using given finite sets of predicates and parameterized inputs is presented. This section also includes a discussion how such sets can be selected with some application examples.
Distinguishing sets of configurations: problem definition
In this paper, we tackle the problem of distinguishing two sets of EFSM configurations where these sets can be either explicitly given or symbolically represented by predicates. As mentioned before, the latter case cannot be handled by existing related work.
Problem Definition: Given an EFSM M = (S, T) over sets X, Y, R, V, D _{ Rx }, D _{ V }, and two disjoint sets of configurations C′, C′′ ⊆ S × D _{ V } of M derive an input sequence that distinguishes the sets of configurations C′ and C′′. A particular case of this problem is deriving a distinguishing sequence for two sets where all configurations of the two sets have the same state. In this case, for disjoint sets C′ = {(s, v): v ∈ V _{ r }} and C′′ = {(s, v′): v′ ∈ V _{ t }}, it holds that the sets V _{ r } are V _{ t } are also disjoint, i.e., V _{ r } ∩ V _{ t } = ∅.
In this paper, we attempt to derive a distinguishing sequence for two disjoint sets C′ and C′′ of configurations of an EFSM M using an abstraction FSM M ^{B} of M. In the following subsection we show how such an FSM abstraction can be derived. We also establish properties of the abstraction FSM; namely, we show that a separating sequence of the sets of abstract states (when it exists) of an abstraction FSM M ^{B} that corresponds to the given sets of configurations C′ and C′′ of the EFSM M is a distinguishing sequence for the sets C′ and C′′, i.e., it distinguishes every two configurations c′ and c′′, c′ ∈ C′ and c′′ ∈ C′′.
FSM predicate abstraction of an EFSM
In this section, an FSM predicate abstraction that suites the distinguishability problem tackled in this paper is proposed. In particular, given an EFSM M and finite sets of predicates B and parameterized inputs P _{ x }, an FSM abstraction is defined using M and the given sets B and P _{ x } and some properties of the abstraction useful for the distinguishing problem are established. We also discuss how sets B and P _{ x } can be derived.
Defining an abstraction FSM
Definition 8: Given an EFSM M = (S, T) over X, Y, R, V, D _{ Rx }, D _{ V } and a parameterized input x, select a set P _{ x } = {p _{ x1} , p _{ x2} … p _{ xl }} such that for each state s, each configuration (s, v) and each outgoing transition from state s under the parameterized input x with the predicate P, there exists p _{ x } ∈ P _{ x } such that (v, p _{ x } ) satisfies P, written (v, p _{ x } )  = P. For EFSM M, we call the parameterized inputs (x, p _{ x }), p _{ x } ∈ P _{ x }, selected (parameterized) inputs and other (parameterized) inputs (x, p _{ x }), p _{ x } ∈ D _{ Rx }\P _{ x }, are nonselected (parameterized) inputs. In Section 3.2.3, several criteria for a proper selection of a set P _{ x } are discussed.
According to Definition 3, for each input sequence α that contains nonparameterized inputs and/or parameterized input (x, p _{ x }) such that p _{ x } ∈ P_{ x } and each configuration (s, v), there exists exactly one trace with the input projection α at the configuration (s, v).
Predicate Abstraction: Given a finite set B of k predicates B _{1}, …, B _{ k } defined over the set of variables W, we define the finite Babstraction a _{B}: D _{ W } → {(0, 1)}^{k} with a _{B}(w) = (b _{1},…, b _{ k }), w ∈ D _{ W }, b _{ i } ∈ {0, 1}, i = 1 .. k. By definition, b _{ i } = 1 iff B _{ i }(w) is True, i.e., iff w satisfies B _{ i } (written w  = B _{ i }); correspondingly, b _{ i } = 0 iff B _{ i }(w) is False, i.e., iff valuation w does not satisfy B _{ i } (written w  ≠ B _{ i }). We note that the abstraction a _{B} is finite, since the number of Boolean vectors of length k is finite. In Section 3.2.1, several ways that can be used for the appropriate selection of the set B are suggested.
Given a set of parameterized inputs P _{ x } and a set of predicates B, an FSM abstraction M ^{B} of the given EFSM specification M is derived as follows:
Definition 9: FSM Predicate Abstraction with Selected Set of Parameterized Inputs: Given an EFSM M = (S, T) over X, Y, R, V, D _{ Rx }, D _{ V } and a finite set B of k predicates B _{1}, …, B _{ k } defined over the set V of variables, and for each (parameterized) input x a selected set of (parameterized) inputs P _{ x }, a predicate abstraction FSM M ^{B} is defined as the FSM (S ^{B}, X ^{B}, Y, h ^{B}) where
S ^{B} = S × ({0, 1}^{k}) is the set of abstract states of the FSM,
X ^{B} = {(x, p _{ x })  x ∈ X, R _{ x } ≠ ∅, p _{ x } ∈ P _{ x }}∪{x  x ∈ X, R _{ x } = ∅} is the set of abstract inputs, and
the behavior relation h ^{B} is constructed using the two rules given below:

1.
For every configuration (s, v) and the predicate P of the outgoing transition (s, x, P, y, up, s′) from state s under a nonparameterized input x, such that v  = P and up(v) = v′, i.e., if M has a transition ((s, v), x, y, (s′, v′)), h ^{B} includes the (abstract) transition ((s, a), x, y, (s′, a′)), a = a _{B}(v) and a′ = a _{B}(v′).

2.
Given a parameterized input x, for every p _{ x } ∈ P _{ x }, every configuration (s, v) and the predicate P of the outgoing transition (s, x, P, y, up, s′) from state s under the parameterized input x, such that (v, p _{ x })  = P and up(v) = v′, i.e. if M has a transition ((s, v), (x, p _{ x }), y, (s′, v′)), h ^{B} includes the (abstract) transition ((s, a), (x, p _{ x }), y, (s′, a′)), where a = a _{B}(v) and a′ = a _{B}(v′).
Example 2. As an example, consider the EFSM M _{2} in Fig. 2 defined over integer variables w and z, (nonparameterized) inputs a and b and outputs 0 and 1. Assume that B is the predicate (w < 2) and B = {B}, thus ~ B is the predicate (w ≥ 2). The FSM abstraction M _{2} ^{B} of M _{2}, shown in Fig. 3, is obtained as follows. Possible abstract states corresponding to state 0 of M _{2} considering B and ~ B are (0, B) and (0, ~B). For w = 0 that satisfy B, the outgoing transition from state 0 under the input b with an update statement w := w + 1 is enabled. Executing this transition the output 1 is produced while the value of w is updated to 1 and the transition leads to state 0 where B holds (as w = 1 satisfies B). Thus, the abstraction FSM has the transitions ((0, B), b, 1, (0, B)). For w = 1 that also satisfies B, the outgoing transition from state 0 under the input b with an update statement w := w + 1 is enabled. Executing this transition the output 1 is produced while the value of w is updated to 2 and the transition leads to state 0 where ~ B holds. Thus, the abstraction FSM has the transition ((0, B), b, 1, (0, ~B)). When w = 2, which satisfies ~ B, for the input b, executing the transition under b makes w = 3, which also satisfies ~ B, while moving to state 0. Thus, in the abstraction FSM we have the transition ((0, ~B), b, 0, (0, ~B)). Furthermore, any value of w ≥ 2, which also satisfies ~ B, executing the outgoing transition from state 0 of M _{2} under b updates the value of w in such a way that ~ B still holds. Thus, for all these configurations with w ≥ 2, in the abstraction FSM we have the transition ((0, ~B), b, 0, (0, ~B)).
Now, also at state 0 of M _{2}, for the valuations w = 0 or w =1, with the corresponding abstract state (0, B), under the input a, the transition (0, a, (w ≤ 2), 0, up, 1), where up contains w := 1, is enabled. Executing this transition leads to state 1 where the value of w is updated to 1 and thus satisfies B. Accordingly in the abstraction FSM we have the transition ((0, B), a, 0, (0, B)). At state 0, when w = 2, which satisfies ~ B, the configuration with w = 2 maps to the abstract state (0, ~B), and a transition (0, a, (w ≤ 2), 0, up,1) under a where up contains w := 1, is enabled. Executing this transition leads to state 1 with output 0 and w is updated to 1 satisfying B. Therefore, the corresponding abstraction FSM has the transition ((0, ~B), a, 0, (1, B)). Configurations with w > 2 satisfy ~ B, and thus for the corresponding abstract state (0, ~B), under the input a the machine executes the transition (0, a, (w > 2), 0, up, 1), where up contains w := 1. Correspondingly, the abstraction FSM moves to state 1 producing the output 0. Thus, in the abstraction FSM we have the transition ((0, ~B), a, 0, (1, B)).
Now, consider state 1 of M _{2} and a corresponding abstract state (1, B). All transitions from state 2 to 1 of M _{2} do not update the value of w, and all other outgoing transitions from state 2 do not update w. Thus, all configurations from state 2 under the input a take the machine to state 1 and lead to valuations of w that still satisfy B. Thus, for state 1, there is the only abstract state (1, B) in the abstraction FSM. At state 1 of M _{2} for the transition under the input b we have the corresponding abstract transition ((1, B), b, 1, (1, B)). At state 1, under the input a, the machine produces 0 while moving to state 2 without updating the value of w, and thus, for all valuations of w, we have the abstract transition ((1, B), a, 0, (2, B). We also observe that for state 2 of M _{2}, there is the only corresponding abstract state (2, B). Moreover, at state 2 under input a, if the value of variable z is even, the machine produces 0 while moving to 2 without updating w. Thus, we have the corresponding abstract transition ((2, B), a, 0, (2, B)). When z is odd the machine produces 1 while moving to state 1 without updating w; thus we have the transition ((2, B), a, 1, (1, B)).
Example 3. As another example, consider EFSM M _{1} in Fig. 1. Let B be the predicate (odd(z)), i.e., B(z) = 1 (hereafter for the sake of simplicity, B(z) = 1 is also written as B) if z is odd and B(z) = 0 (also written as ~ B) if z is even. An abstraction FSM M _{1} ^{B} of M _{1} derived using B = {B} and selected set of parameterized inputs P _{ a } for a.i = 1, a.i = 5, a.i = 6 is shown in Fig. 4. Example 4 given later illustrates how the items in P _{ a } are selected for this given example.
Given EFSM M and its abstraction M ^{B}, let (s, v) be a configuration of EFSM M. We denote A ^{B}(s, v) the abstract state (s, a) of FSM M ^{B} such that a = (B _{1}(v),…, B _{ k }(v)) (also written A (s, v) when it is not necessary to indicate the use of the set B of predicates) while using A ^{1}(s, a) (or \( {\mathrm{A}}^{{\mathrm{B}}^{\hbox{} 1}} \)(s, a)) to denote the inverse of (s, a), i.e., the set of all configurations (s, v) such that a = (B _{1}(v), …, B _{ k }(v)).
For the set of configurations C = {(s, v): s ∈ S, v ∈ D _{ V }}, we denote A(C) the set of all abstract states (s, a), ∃ (s, v) ∈ C, A(s, v) = (s, a). We write A ^{B}(C) when necessary to indicate the use of the set B. The notion, A ^{1}(C) (also written A ^{B1}(C) when necessary) for the set C ^{B} = {(s, a); a ∈ {0, 1}^{B}} denotes the union of the inverse of the union of the inverse over all (s, a) ∈ C ^{B}, i.e., the subset of configurations (s, v) of M such that A(s, v) ∈ C ^{B}.
An FSM abstraction M ^{B} is not unique as it depends on selected sets of parameterized inputs P _{ x }. However, if the set P _{ x } is set then by construction, an obtained FSM abstraction M ^{B} is complete under nonparameterized inputs and selected parameterized inputs of P _{ x } but M ^{B} can be nondeterministic. In fact, the following properties hold for an obtained FSM abstraction M ^{B}.
Proposition 1:

(1)
For each (s, v) and (s′, v′) such that there exists a transition (s, x, P, y, up, s′), where x is a nonparameterized input, v  = P, v′ = up(v), there exists a corresponding abstract transition ((s, a _{B}(v)), x, y, (s′, a _{B}(v′))) in M ^{B}.

(2)
For each configuration (s, v) and each p _{ x } ∈ P _{ x }, such that there exists a transition (s, x, P, y, up, s′) with parameterized input x, where (v, p _{ x } )  = P, v′ = up(v, p _{ x }), there exists a corresponding (abstract) transition ((s, a _{B}(v)), (x, p _{ x }), y, (s′, a _{B}(v′)) in h ^{B}.
In fact, for each nonparameterized input x there exists a corresponding (abstract) transition ((s, a _{B}(v)), x, y, (s′, a _{B}(v′)) in h ^{B} since the EFSM M is input complete. Furthermore, for each parameterized input x, there exists a corresponding (abstract) transition ((s, a _{B}(v)), (x, p_{ x }), y, (s′, a _{B}(v′)) in h ^{B} as M is input complete and according to the choice of P_{ x } (Definition 8). Using the induction on the trace length, the following statement can be established about the relationship between traces of the initial EFSM M and its abstraction FSM M ^{B}.
Proposition 2:

(1)
Let σ = (x _{1} , p _{ x1} )/y _{1}… > (x _{ l } , p _{ xl } )/y _{ l } be a trace of EFSM M at configuration (s _{1}, v), i.e. (s, v) σ  > .
A trace over nonparameterized and/or some selected parameterized inputs at configuration (s _{1}, v) of EFSM M is also a trace at the corresponding abstract state A(s _{1}, v) of FSM M ^{B}. However, a trace at the configuration (s _{1}, v) that has some nonselected parameterized inputs is not a trace at the corresponding abstract state of M ^{B}, i.e., the following (a), (b), and (c) statements hold:

a.
Given a trace σ at the configuration (s _{1}, v), if the input projection α = x _{1} … x _{ l } of σ is defined only over nonparameterized inputs, i.e. x _{1} ,.., x _{ l } are nonparameterized, then σ is also a trace at state A(s _{1}, v) of an FSM M ^{B},

b.
Given a trace σ at the configuration (s _{1}, v), if the input projection α of σ is defined over selected parameterized and possibly over some nonparameterized inputs, then σ is a trace at A(s _{1}, v) of the FSM M ^{B}.

c.
Given a trace σ at the configuration (s _{1}, v), if the input projection α of σ is defined over some nonselected parameterized and possibly over some nonparameterized inputs, then σ is not a trace at state A(s _{1}, v) of M ^{B}.

a.

(2)
Given a trace σ = (x _{1} , p _{ x1} )/y _{1} (x _{ l } , p _{ xl } )/y _{ l } of the abstraction FSM M ^{B} at abstract state (s _{1}, a), it can happen that for a configuration (s _{1}, v) ∈ A ^{1}(s _{1}, a) of EFSM M, σ is not a trace at (s _{1}, v).

(3)
If σ is a trace at an abstract state (s, a) of FSM M ^{B} then at each configuration (s _{1}, v) ∈ A ^{1}(s _{1}, a) of EFSM M, there exists a single trace σ′ with the input projection α. That is, given a state (s _{1}, a) of an abstraction FSM M ^{B}, let σ = (x _{1}, p_{ x1})/y _{1}… >  (x _{ l }, p_{ xl })/y _{ l } be a trace at state (s _{1}, a) of FSM M ^{B} with the input projection α. Then at each configuration (s _{1}, v) ∈ A ^{1}(s _{1}, a) of EFSM M, there exists a trace σ′ such that the input projection of σ′ is α.
Proposition 3: Given two disjoint sets of configurations C′ and C′′ of EFSM M and their corresponding sets of abstract states S′ = A(C′) and S′′ = A(C′′) of an abstraction FSM M ^{B}. If α is a separating sequence for the sets S′ and S′′, then α is a distinguishing sequence for the sets C′ and C′′ of M. That is, α is a distinguishing sequence for each pair of configurations (s, v _{ r }) and (s′, v _{ u }) of M such that A(s, v _{ r }) ∈ S′, A(s′, v _{ u }) ∈ S′′.
Proof. Given two disjoint sets of configurations C′ and C′′ of EFSM M, let α be a separating sequence for corresponding sets of abstract states S′ = A(C′) and S′′ = A(C′′) of an abstraction FSM M ^{B}. Consider two configurations (s′_{1}, v′) ∈ C′ and (s′′_{1}, v′′) ∈ C′′. Also consider the sets Tr _{1} of all traces at state (s′_{1}, a′) = A(s′_{1}, v′) and Tr _{2} at state (s′′_{1}, a′′) = A(s′′_{1}, v′′) with the input projection α. The sets of output projections of traces of Tr _{1} and Tr _{2} are disjoint, since α is a separating sequence for states (s′_{1}, a′) and (s′′_{1}, a′′) of M ^{B}. Due to the definition of the abstraction FSM, α can have only nonparameterized inputs and/or parameterized inputs (x, p _{ x }) where p _{ x } ∈ P _{ x }. According to Definition 8, for the sets of traces Tr _{ M1} at state (s′_{1}, v′) ∈ C′ and Tr _{ M2} at (s′′_{1}, v′′) ∈ C′′ with the input projection α it holds that Tr _{ M1} ⊆ Tr _{1} and Tr _{ M2} ⊆ Tr _{2}. Since the sets Tr _{1} and Tr _{2} do not intersect, the sets of output responses at states (s′_{1}, v′) and (s′′_{1}, v′′) to α are different, and thus α is a distinguishing sequence of these two configurations.
By definition of a separating sequence, if the sets S′and S′′ intersect then there is no a separating sequence for these sets. We further describe how the set of predicates B is derived using the initial sets of configurations of C′ and C′′ of EFSM M in such a way that the corresponding abstract states S′ and S′′ are disjoint. In fact, a distinguishing sequence for C′ and C′′ derived using an FSM abstraction M ^{B} can also distinguish many other configurations of M as illustrated in Proposition 3.
On selecting the initial set of predicates
Given EFSM M and the sets of configurations C′ and C′′, below we describe how an initial set of predicates B can be constructed when the sets of configurations are either explicitly given or symbolically specified by predicates.
Let configurations of the sets C′ and C′′ be explicitly enumerated and V _{ t } and V _{ r } be the sets of valuations of configurations of C′ and C′′ correspondingly. Since configurations of the sets C′ and C′′ can have different states, the sets of valuations V _{ r } and V _{ t } are not necessarily disjoint. In this case, the initial set of predicates B = {B _{1}, B _{2}} can be constructed in the following way:

(i)
∀ v ∈ V _{ r }\(V _{ r } ∩ V _{ t }), v  = B _{1} ∧ v  ≠ B _{2},

(ii)
∀ v ∈ V _{ t } \ (V _{ r } ∩ V _{ t }), v  = B _{2} ∧ v  ≠ B _{1},

(iii)
∀ v ∈ D _{ V }\(V _{ r } ∪ V _{ t }), v  ≠ B _{1} ∧ v  ≠ B _{2},

(iv)
∀ v ∈ (V _{ r } ∩ V _{ t }), v  = B _{1} ∧ v  = B _{2}.
By construction, for every configuration v ∈ V _{ r }\(V _{ r } ∩ V _{ t }), it holds that a _{B}(s _{ p } , v) = (s _{ p }, B _{1}, ~B _{2}), for every v ∈ V _{ t }\(V _{ r } ∩ V _{ t }) it holds that a _{B}(s _{ q } , v) = (s _{ q }, ~B _{1}, B _{2}).
Moreover, for every v ∈ (V _{ r } ∩ V _{ t }), it holds that a _{B}((s, v)) = (s, B _{1}, B _{2}), and for every v ∈ D _{ V }\{V _{ r } ∪ V _{ t }} it holds that a _{B}((s, v)) = (s, ~B _{1}, ~B _{2}). Therefore, for the above predicates B _{1} and B _{2} and disjoint sets of configurations C′ ∪ C′′, the sets S′ = A(C′) and S′′ = A(C′′) are disjoint. In this case, a separating sequence for the two sets of abstract states S′and S′′ (when such a sequence exists), is a distinguishing sequence for every two configurations c′ and c′′, c′ ∈ C′, c′′ ∈ C′′.
When all the explicitly specified configurations of the sets C′ and C′′ have the same control state s, i.e., C′ = {(s, v) : v ∈ V _{ r } ⊂ D _{ V }} and C′′ = {(s, v) : v ∈ V _{ t } ⊂ D _{ V }} and V _{ r } ∩ V _{ t } = ∅, rule (iv) is not applicable. In this case, for every configuration p ∈ C′, a _{B}(p) = (s, B _{1}, ~B _{2}), and for every configuration q ∈ C′′, a _{B}(q) = (s, ~B _{1}, B _{2}), and for every configuration (s, v) in the set {(s, v) : v ∈ D _{ V }\{V _{ r } ∪ V _{ t }}}, it holds that a _{B}((s, v)) = (s, ~B _{1}, ~B _{2}). In this case, a separating sequence for the two abstract states (s, B _{1}, ~B _{2}) and (s, ~B _{1}, B _{2}) (when such a sequence exists), is a distinguishing sequence for every two configurations c′ and c′′, c′ ∈ C′, c′′ ∈ C′′.
Our work can also be applied to distinguishing two disjoint symbolically described sets of configurations C′ and C′′. In this case, the sets are not necessary finite and can be described using sets of assertions.
As a simple example, consider EFSM M _{1} in Fig. 1 and the sets C′ = {(s, z) : s ∈ S and z is odd} and C′′ = {(s, z) : z is even} where these two sets are infinite. These two sets can be represented using the predicates B and ~ B, where B is the predicate (odd(z)), i.e., B(z) = 1 if z is odd, and ~ B is the predicate (even (z)), i.e., B(z) = 0 if z is even. An FSM abstraction M _{1} ^{B} of M _{1} derived using B = {B} and a selected set of parameterized inputs is shown in Fig. 4.
As another example, consider two context variables w and z that have the set of integers as the specification domain. Given vector v of valuation of variables w and z, we use w(v) (or z(v)) for the value of the variable w (or z) in the valuation vector. Valuations of disjoint sets V _{ r } and V _{ t } can also be described as predicates as shown in Table 1.
For specifications where valuations are Boolean and guards are defined over Boolean variables, implicit (disjoint) sets V _{ r } and V _{ t } can also be described using corresponding predicates. We demonstrate how this can be done for two Boolean context variables w and z using the traditional XOR and OR operators as shown in Table 2.
On selecting a set of parameterized inputs P_{ x }
An abstraction FSM M ^{B} depends on the set of predicates B as well as on selected set of parameterized inputs P _{ x }. In Section 4, we discuss how a set B can be constructed in order to increase the chance of separating designated states in the abstraction FSM M ^{B} and here we briefly discuss some criteria for selecting a set P _{ x } of parameterized inputs such that the chance of separating states in an FSM abstraction M ^{B} is increased. This can be done, for example, by reducing the degree of nondeterminism through reducing the number of nondeterministic transitions of the machine, and thus increasing the chances of having separating sequences. That is, by reducing nondeterminism of an abstraction FSM, the number of output sequences produced at two (or more) states in response to an input sequence usually decreases; and thus the possibility of producing disjoint output responses, i.e. separating sequences, in response to the input sequence increases.
The degree of nondeterminism can be defined in several ways as follows:

(1)
One way is to define the degree of nondeterminism as the average number of outgoing transitions under a selected input (x, p _{ x }) at an abstract state (or at a set of abstract states). Given a state s of M and a set of predicates B, an example of reducing nondeterminism is when the valuations of M are canonically partitioned (using B) into m disjoint subsets: valuations of each subset have the same abstract image while valuations of different subsets are mapped into different abstract states. A parameterized input (x, p _{ x }) is selected in such a way that the average number of outgoing transitions under (x, p _{ x }) at the m abstract states is minimized.

(2)
One also can think of reducing nondeterminism by selecting (x, p _{ x }) such that for a maximum number m′ of the m abstract states, the number of outgoing transitions under (x, p _{ x }) at each state of the m′ states is minimized.

(3)
Another criterion for increasing the chance of separating states in an FSM abstraction is to choose an input (x, p _{ x }) such that a large number of the m abstract states are separable by (x, p _{ x }).
In fact, one can think of applying the above criteria for the selection of (parameterized) inputs considering all states of M or only to a (properly selected) subset of these states.
Example 4. In Example 3, given EFSM M _{1} (Fig. 1), a corresponding FSM abstraction M _{1} ^{B} (Fig. 4) is derived using B = {B = odd(z)} and the set P _{ a } = {i = 1, i = 5, i = 6}. Below, we informally describe a way that can be used for the selection of a set P _{ a } based on appropriate partitioning of valuations.
The abstraction a _{B}(s, z) of all configurations (1, z) where z is odd is the abstract state (1, B) and abstraction a _{B}(s, z) of all configurations (1, z) where z is even is the abstract state (1, ~B).
Consider state 1 of M _{1} and all valuations of z that satisfy ~ B, i.e., z is even, the corresponding abstract state of all these valuations is the state (1, ~B).
Consider the outgoing transition (1, a, (1 ≤ a.i ≤ 4), 0, z = z + 1, 2) at state 1 defined under input a(i), all values a.i that satisfy the guard (1 ≤ a.i ≤ 4) of this transition, i.e., a.i = 1, 2, 3, 4, move M _{1} from state 1 to state 2 where the update statement z := z + 1 results in the value of z that satisfies B (z is odd). Thus, select one of these values, here select a.i = 1, include 1 into (initially empty) set P _{ a }. Correspondingly, the FSM abstraction has the transition ((1, ~B), (a,1), 0, (2, B)).
Consider the outgoing transition (1, a, (a.i ≥ 5), 1, z = z + a.i, 1) at state 1 defined under input a(i). All values of a.i that satisfy the guard a.i ≥ 5 are partitioned into two disjoint sets where the value a.i is odd or a.i is even. All inputs of the former set move M _{1} to state 1 with odd z value (i.e. z satisfies B) and all inputs of the latter set move M _{1} to state 1 with even z value (i.e. z satisfies ~ B). Correspondingly, from each subset, we select one value of a parameterized input and add the value to the set P _{ a }. In particular, for the former set, select a.i = 5, add 5 to P _{ a }, and from the latter set select a.i = 6, add 6 to P _{ a } and obtain P _{ a } = {1, 5, 6}. In this case, the FSM abstraction includes the transitions ((1, ~B), (a, 5), 1, (1, B)) and ((1, ~B), (a, 6), 0, (1, ~B)).
Considering all other states of M _{1} in the same way we obtain P _{ a } = {1, 5, 6} and the FSM abstraction shown in Fig. 4.
We recall that in this paper we derive an FSM abstraction using for every input x the same set P _{ x } (of selected inputs) over all states s _{1}, … s _{ n } of the given EFSM. Another way of deriving an abstraction can be carried out using different (not necessarily disjoint) sets say P ^{s1} _{ x }, P ^{s2} _{ x }, P ^{sn} _{ x } for the states s _{1}, … s _{ n }. However, in this case, an FSM abstraction can be partial under the union of these sets. Thus, a trace defined over the union of these sets may not be a trace of an obtained FSM abstraction, and correspondingly, a distinguishing sequence for two sets of configurations of M may not be defined at the corresponding sets of abstract states.
A method for distinguishing sets of configurations of an EFSM
Method overview
In this section we present an algorithm for distinguishing two disjoint sets of configurations C′ and C′′ of an EFSM M by deriving a separating sequence for the corresponding sets of abstract states S′ and S′′ in the corresponding FSM abstraction. In Section 3, we demonstrated how to construct the set of predicates in such a way that the set of predicates encodes configurations in C′ and C′′ into two different sets of abstract states. If the sets of abstract states are separable, then a separating sequence is a distinguishing sequence for C′ and C′′. However, if no separating sequence exists for the corresponding sets of abstract states then C′ and C′′ can still be distinguishable but such a distinguishing sequence cannot be derived using a current FSM abstraction. Accordingly, the abstraction is refined and the above process is repeated till either a separating sequence is obtained or a given maximum number of refinements is carried out. The abstraction is refined in such a way that the possibility of finding a distinguishing sequence in a refined abstraction is enhanced. Two types of refinements are considered, namely, a predicate refinement and a refinement based on selected sets of parameterized inputs as is illustrated in details in Section 5. A highlevel overview of the algorithm is provided below and the detailed algorithm is given in the following subsection. The algorithm inputs an EFSM specification M, a set of selected inputs of M, and two sets of configurations C′ and C′′ and outputs a distinguishing sequence or a message indicating that a sequence is not determined for the given sets.

1.
Derive the set of predicates

2.
Derive an FSM abstraction of M

Consider the sets of abstract states S′ and S′′ that correspond to the sets of configurations C′ and C′′, respectively.

If S′ and S′′ are separable in the abstraction FSM by a separating sequence α

then Return α


Else

Refine the set of predicates and repeat (1) and (2) as long the (given) maximum number of allowed refinements is not reached.



3.
Return a message “a distinguishing sequence is not determined”
Algorithm for distinguishing two sets of EFSM configurations
Here we provide an algorithm for the method given above for distinguishing two disjoint sets of configurations C′ and C′′ by deriving a separating sequence for the corresponding sets of abstract states S′ and S′′ in a corresponding abstraction FSM. We note that Step 2 of the above method is further divided into two substeps. In Step 2.1, the algorithm tries to derive a separating sequence from an FSM abstraction using only nonparameterized inputs of the EFSM specification M as such an abstraction is usually smaller and less nondeterministic than an abstraction derived using both nonparameterized and selected parameterized inputs (Step 2.2). In both cases, after deriving an FSM abstraction, determining a sequence that distinguishes the two given sets of EFSM configurations is done by finding a separating sequence for the corresponding sets of abstract states S′ and S′′ in the FSM abstraction. For deriving a separating sequence the algorithm in (Spitsyna et al. 2007) can be used where the root of the successor tree of the abstraction FSM is labeled by the set of all pairs of S′ × S′′ and the unsuccessful termination rule is extended to handle the case when some pairs of states of the set labeling a node have the same state as a successor under some input/output. If no distinguishing sequence is found against a current abstraction, then a current FSM abstraction is refined as it is illustrated in details in Section 5.
Due to Proposition 3, given two disjoint sets of configurations C′ and C′′ of EFSM M and their corresponding sets of abstract states S′ = A(C′) and S′′ = A(C′′) of an abstraction FSM M ^{B}, if the algorithm returns a separating sequence α for the sets S′ and S′′, then α is a distinguishing sequence for the sets C′ and C′′ of M. Thus, the following statement holds.
Theorem 1: A separating sequence α derived using Algorithm 1 (when such a sequence exists) is a distinguishing sequence for the sets C′ and C′′ of EFSM M.
An application example of Algorithm 1 is given below. More related application examples are provided in the following sections.
Example 5: As an example of Algorithm 1, consider an EFSM in Fig. 1 and two infinite sets C′ and C′′ of configuration, C′ = {(s, z): z is odd} and C′′ = {(s, z): z is even}. An FSM abstraction derived at Step 2 over the nonparameterized input b does not distinguish the sets C′ and C′′. At Step 3, the FSM abstraction M _{1} ^{B} (shown in Fig. 4) is derived using B = {B = odd(z)} and the set P _{a} for a.i = 1, a.i = 5, a.i = 6 as illustrated in Example 4. The sets of abstract states corresponding to the sets and C′ and C′′ are S′ = A ^{B}(C′) = {(1, B), (2, B)} and S′′ = A ^{B}(C′′) = {(1, ~B), (2, ~B)}. The sequence (a, 5) (a, 1) (a, 1) is a separating sequence for the sets S′ and S′′ of abstract states, and thus this sequence is a distinguishing sequence for the sets C′ and C′′.
The complexity of deriving a FSM abstraction from an EFSM depends on the types and operations on data variables used in the EFSM. In general, for a given set of predicates, the construction of the abstract FSM amounts to the computation of a finite number of transitions, where for every transition, an existential quantifier elimination involving data variables from the EFSM is performed (Graf & Saidi 1997; Bensalem et al. 1998). For instance, the general case of integer data and addition only correspond to Presburger arithmetic and has worstcase superexponential complexity (Fischer & Rabin 1974). Complexity decreases however to polynomial if only difference/octagonal constraints appear in transitions and predicates e.g., of the form ± x ± y ≤ c. If multiplication is allowed, quantifier elimination becomes undecidable and therefore automatic derivation of an FSM abstraction is not feasible in general. Obviously, if all EFSM data are interpreted on finite domains, quantifier elimination is decidable. For Booleans, quantifier elimination reduces to a SAT problem, which is known to be NPcomplete. Furthermore, the problem of deriving a separating sequence for the set of states of a deterministic FSM is PSCOMPLETE (Lee and Yannakakis (Lee & Yannakakis 1994) for complete machines, Hierons and Türker for partial machines (Hierons & Türker 2014)). For nondeterministic FSMs, Kushik and Yevtushenko (Kushik & Yevtushenko 2015) have shown that the problem of deriving a separating sequence for the set of states of a nondeterministic FSM is PSCOMPLETE. It is also known that in the worst case the length of a separating sequence even for two states is exponential w.r.t. the number of FSM states (Spitsyna et al. 2007). However, our experiments show that if a separating sequence exists then this sequence usually is very short (Spitsyna et al. 2007).
Predicate refinement
Given two disjoint sets of configurations C′ and C′′ and their corresponding disjoint sets of abstract states, a separating sequence (if it exists) for the abstract states distinguishes all pairs of configurations c′ and c′′, c′ ∈ C′, c′′ ∈ C′′. However, if there is no such separating sequence we can refine the abstraction, for example, by considering more predicates D = B ∪ B′ and deriving an abstraction A ^{D}. Given an EFSM M and an abstraction M ^{B} for B and P _{ x }, the predicate refinement of M ^{B} is carried out by expanding the set of predicates B to a set D and deriving an abstraction M ^{D} using the same, i.e., the unchanged, set P _{ x }. A refined FSM abstraction M ^{D} has more abstract states than M ^{B} and this usually reduces the degree of nondeterminism in M ^{D} compared with M ^{B} and thus increases the chance of the existence of a separating sequence.
Predicate refinement methods
Consider an abstraction M ^{B} for B and P _{ x }, here we consider three ways for constructing and adding to the set B a new predicate B′ so that a refined abstraction M ^{D} is derived using D = B ∪ B′ and P _{ x }.

(1)
Predicate derived based on a selected set of valuations
Consider the sets of configurations C′ and C′′ with their corresponding sets of valuations V _{ t } and V _{ r }, respectively. Let M ^{B} be an FSM abstraction for a selected set of parameters P _{ x } and a set of predicates B = {B _{1}, B _{2}} derived, for example, as illustrated in Section 3.2.2. The initial set of predicates B = {B _{1}, B _{2}} can be refined by adding to B a predicate B ′ ∉ B that partitions valuation of some/all the sets V _{ r }, V _{ t }, D _{ V } \{V _{ r } ∪ V _{ t }}, and V _{ r } ∩ V _{ t }.
Let V ′ ⊂ D _{ V } be a selected set of valuations, construct a predicate B ′ ∉ B such that for every valuation v ∈ V ′, v  = B ′ and for every v ∈ D _{ V }\V ′, v  ≠ B ′, and derive an FSM abstraction M ^{D} using D = {B _{1}, B _{2}} ∪ {B ′}. For every configuration (s, v), s ∈ S, v ∈ D _{ V }, let a _{B}(s, v) be the abstract state (s, a), where a = (B _{1}(v),…, B _{ k }(v)), then by construction, a _{D}(s, v) = (s, a, B ′) if v  = B ′ and a _{D}(s, v) = (s, a, ~B ′) if v  ≠ B ′. As the sets of abstract states A ^{B}(C ′) and A ^{B}(C ′′) are disjoint by construction, the sets A ^{D}(C ′) and A ^{D}(C ′′) are also disjoint.
By construction, the added predicate results in an FSM abstraction M ^{D} with more abstract states than M ^{B}, and this can reduce nondeterminism in the abstraction FSM and thus, can enhance chances for deriving a separating sequence for sets A ^{D}(C ′) and A ^{D}(C ′′) that is a distinguishing sequence for C ′ and C ′′. Usually, splitting states of a current abstraction can be effective when V ′ is selected as a subset of one of the sets V _{ r }, V _{ t }, D _{ V } \{V _{ r } ∪ V _{ t }}, or V _{ r } ∩ V _{ t }.

(2)
Predicate derived based on states of an abstraction FSM M ^{B}
Splitting valuations can also be done based on selected state(s) of an abstraction FSM M ^{B}.
Given M ^{B}, select an abstract state r = (s _{ r } , a) such that r has many outgoing transitions under a (parameterized) input (x, p _{x}). Then, considering the prototype configurations of r, i.e. the set (s _{ r }, v _{ r }) ∈ A ^{1}(s, a), construct a predicate B ′ such that valuations of the set A ^{1}(s, a) is split into disjoint sets V _{ i } and V _{ j } where in a refined FSM abstraction M ^{D}, D = B ∪ {B′}, configurations (s _{ r }, v), v ∈ V _{ i }, are mapped into an abstract state (s _{ r }, a′), and configurations (s _{ r }, v), v ∈ V _{ j }, are mapped into another abstract state (s _{ r }, a′′) and the sets of outputs of outgoing transitions under (x, p _{ x }) at (s _{ r }, a′) and at (s _{ r }, a′′) are disjoint, or the number of outgoing transitions under (x, p _{x}) at (s _{ r }, a′) and at (s _{ r }, a′′) of M ^{D} are less than those at (s _{ r }, a) of the FSM abstraction M ^{B}.

(3)
Predicate derived based on guards of the specification EFSM
Another way of predicate refinement is to add new predicates into a given set of predicates, for example, the guards of the given EFSM specification that are defined only over context variables. These guards are special as they are part of the specification and including these guards into an abstraction predicates splits naturally (as in the specification) states in a refined abstraction and thus, reduces nondeterminism in a refined abstraction.
Consider an EFSM M where P = {P _{1},.. P _{ m }} is the set of all guards of M defined only over context variables and its abstraction M ^{B}. Consider the set D = B ∪ P of (k + m) predicates and derive a predicate abstraction M ^{D} using the same set P _{ x } that is used for deriving M ^{B}. We note that if the set P of guards is empty, we do not consider guard refinement.
Example 6. As an example of Algorithm 1 and guard refinement, consider the two configurations p = (0, w = 0) and q = (0, w = 2) of M _{2} in Fig. 2. Let B be the predicate (w < 2) and B = {B}. The corresponding FSM abstraction M _{2} ^{B} is shown in Fig. 3.
By definition, A ^{B}(p) = (0, B) and A ^{B}(q) = (0, ~B). The abstract states A ^{B}(p) = A ^{B}(q) are nonseparable in M _{2} ^{B} (Step 2 of Algorithm 1). Step3 is not applied as M _{2} has no parameterized inputs. At Step4, consider a refinement using the guard P (even(z)) of M _{2}, i.e., D = B ∪ {P}, and construct an abstraction FSM M _{2} ^{D} shown in Fig. 5. For the set D, A ^{D}(p) = (0, B, P) and A ^{D}(q) = (0, ~B, P). The sequence aaa is a separating sequence for these two abstract states and thus, aaa is a distinguishing sequence for the configurations p and q. In fact, aaa is also a distinguishing sequence for each pair p and q of configurations, p ∈ \( {\mathrm{A}}^{{\mathrm{D}}^{\hbox{} 1}} \)(0, B, P) and q ∈ \( {\mathrm{A}}^{{\mathrm{D}}^{\hbox{} 1}} \)(0, ~B, P). Thus, the refinement results in refining/splitting states and this allows us to distinguish more states in the obtained FSM abstraction (Fig. 5) than in M _{2} ^{B} (Fig. 3) and thus, to distinguish in M _{2} (Fig. 2) some configurations for which we cannot derive a distinguishing sequence using M _{2} ^{B}.
Example 7. As another example, consider the FSM M _{2} in Fig. 2 with context variables V = {w, z}. Let V _{ r } be the valuations {(w = 0, z ≥ 0), (w = 1, z ≥ 0)}, and V _{ t } be the valuations {(w = 4, z ≥ 0), (w = 6, z ≥ 0)}. Let C′ = {(0, v) : v ∈ V _{ r }} and C′′ = {(0, v) : v ∈ V _{ t }}. Consider B = {B _{1}, B _{2}} such that configurations in C′ are mapped into the abstract state S′ = (0, B _{1}, ~B _{2}) of the FSM abstraction and configurations in C′′ are mapped into the abstract S′′ = (0, ~B _{1}, B _{2}). The abstract states S′ and S′′ are nonseparable in such FSM abstraction. Refining the abstraction by considering D = B ∪ P where P is the guard even(z) of M _{2}, thus, ~P if z is odd, we obtain an FSM where the configurations in C′ are mapped into abstract states of the set S′ = {(0, B _{1}, ~B _{2}, P), (0, B _{1}, ~B _{2}, ~P)} and the configurations in C′′ are mapped into the abstract states of the set S′′ = {(0, ~B _{1}, B _{2}, P), (0, ~B _{1}, B _{2}, ~P)}. The sequence a a a is a separating sequence for the sets S′ and S′′. The obtained sequence distinguishes any two configurations c′ and c′′, c′ ∈ C′, c′′ ∈ C′′.
In general, the complexity of the refinement is tightly related to the data and operations used in EFSM. Predicate refinement is at the heart of CEGARbased (CounterExampleGuided Abstraction Refinement) automated verification (Clarke et al. 2003). In recent years, this approach has been thoroughly investigated in the context of software verification. In particular, interpolation has been proposed as a general effective technique to extract information from spurious counterexamples in order to refine the abstract model (see e.g., (Henzinger et al. 2004) for an introduction). In our context, if we consider predicate abstraction when the domains of variables are finite we get polynomial complexity by selecting appropriately the predicates of the machine for the refinement when a predicate abstraction is based on adding guards of the specification. Also, when selecting predicates for reducing the nondeterminism of the abstraction FSM, one can appropriately select a partition over the set of given valuations. We note that checking the existence of a separating sequence is based on the derivation of a socalled FSM successor tree and this tree can be considered as a counterexample when a separating sequence does not exist. For example, the tree can be used as a guide when selecting predicates for reducing the nondeterminism of an FSM abstraction. In all cases, investigating and elaborating heuristics for reducing the complexity of refining a predicate abstraction for the considered problem is an interesting direction for future research.
Relationship between distinguishing configurations of an abstraction and a refined predicate abstraction
The following propositions establish the correspondence between states of an abstraction FSM and their corresponding states in a refined abstraction FSM. The predicate refinement step of Algorithm 1 (Step3) relies on this correspondence for deriving separating sequences against a refined FSM abstraction.
Proposition 4. Given an EFSM M, two sets of configurations C′ and C′′ of EFSM M and an abstraction FSM M ^{B} of M, let an abstract FSM M ^{D} be a predicate refinement of M ^{B}. If states A ^{B}(C′) and A ^{B}(C′′) of FSM M ^{B} can be separated by an input sequence α then states A ^{D}(C′) and A ^{D}(C′′) of the abstract FSM M ^{D} can also be separated by α.
Definition 10: Given a Boolean vector a of length k, a Boolean vector a′ of length n, n ≥ k, is an extension of a if a′ = ac where c is a Boolean vector of length n  k.
Proposition 5. Given an EFSM M, let M ^{B} be an FSM abstraction of M constructed by a set B of predicates and D be the set of predicates that contains B. The following statements hold:

(1)
Given states (s, a′) of M ^{D} and (s, a) of M ^{B}, the set of configurations that are mapped by D into abstract state (s, a′) is a subset of the set of configurations mapped by B into abstract state (s, a) where a′ is the extension of a. That is, if a′ is an extension of a then \( {\mathrm{A}}^{{\mathrm{D}}^{\hbox{} 1}} \)(s, a′) ⊆ \( {\mathrm{A}}^{{\mathrm{B}}^{\hbox{} 1}} \)(s, a).

(2)
The union of configurations that lead to abstract states (s, a′) where a′ is an extension of a is actually the set of configurations that lead to the abstract state (s, a). That is for each state (s, a) of M ^{B}, it holds that the set of configurations \( {\mathrm{A}}^{{\mathrm{B}}^{\hbox{} 1}} \)(s, a) is the union of the sets of configurations \( {\mathrm{A}}^{{\mathrm{D}}^{\hbox{} 1}} \)(s, a′) over all (s, a′) such that a′ is an extension of a.
Discussion: Limitations of the proposed work
In general, an EFSM can have parameterized outputs and the work can be adapted to EFSMs with output parameters. In this case, the values of parameterized outputs obtained when deriving an FSM abstraction are included into the FSM abstraction outputs, i.e., an abstract FSM output is the concatenation of the original EFSM output symbol and the obtained valuation of output parameters.
In practice, an EFSM specification can be partial. The work presented in this paper can be used for partial EFSM specifications that are completed by adding selfloop transitions with null outputs. However, it is worth to extend the proposed work to partial specifications considering only the defined partial behavior of the specification EFSM. We think that this can be done by using the work presented in (Kushik et al. 2014) that handles the derivation of a separating sequence using only the defined inputs of the machine.
Though this paper establishes the theoretic framework for solving the considered problem; however, there is a need to empirically assess the proposed method using many application examples. This requires; for instance, assessing the proposed work using several randomly generated EFSM specifications or EFSMs of realistic application examples (case study). For this purpose there is a need for the development and assessment of software tool that derives randomly generated EFSM specifications considering the various attributes of the EFSM model. In addition, this also requires the development of a software tool that implements the proposed method and then the use of the tool in the empirical assessment. The tool has to handle the derivation of (a) an abstraction FSM from the given EFSM specification, (b) a separating sequence for the considered sets, and (c) a refined abstraction. We think that the known verification IF tool (Bozga et al. 2004; Mounier et al. 2002) can be easily tailored to dealing with (a) when the designer provides the initial sets of predicates and parameterized inputs used by the proposed method and when predicate abstraction is carried out using the guards of the specification machine. However, in order to deal with the automatic derivation of the sets of predicates and selected inputs and to refine the abstraction based on valuations or states of an abstraction, then there is a need to implement and incorporate the heuristics given in this paper into the IF tool. The tool we have used in (Spitsyna et al. 2007) can be used for the derivation of separating sequences.
Conclusions and future work
Given two disjoint sets, specified possibly over (infinite) sets of Extended Finite State Machine (EFSM) configurations, a method for deriving an input sequence that distinguishes each pair of configurations of these sets is proposed. The method is based on deriving such a sequence for designated sets of states of an FSM abstraction. The FSM abstraction is derived from the given EFSM specification using selected sets of predicates and parameterized inputs. If a distinguishing sequence for the corresponding two sets of abstract states is not found using the current FSM abstraction, the abstraction is refined. A refined FSM abstraction is derived by adding more predicates or more inputs to the selected sets of predicates and inputs in order to reduce nondeterminism in the abstraction FSM. Some refinement strategies are discussed. The work can be applied in various domains such as EFSMbased test derivation, mutation testing, and fault diagnosis.
Finally, in EFSM fault diagnosis (ElFakih et al. 2003), several EFSMs, socalled fault functions, are constructed using different types of EFSM faults. In particular, from a given EFSM specification and a selected type of fault, an EFSM with the selected type of faults is derived. For instance, common types of EFSM faults (Bochmann & Petrenko 1994; ElFakih et al. 2003) include output, transfer, predicate, and assignment faults. Then, fault diagnosis is carried out by deriving tests distinguishing between these EFSM fault functions. The fault functions are specified as complete nondeterministic EFSMs. Thus, the proposed work can be used to derive diagnostic tests provided the work is extended to handle nondeterministic EFSM specifications. Our preliminary investigation shows that the work presented in this paper can be used for distinguishing two configurations of a nondeterministic EFSM. In fact, in this case, in the abstraction function (Definition 9), for a given configuration and parameterized input, there could be many enabled transitions at a state with the same parameterized input and the abstraction function takes into consideration all such transitions. However, a thorough investigation of adapting the presented work to nondeterministic EFSMs would be interesting and to the best of our knowledge no work has been done on distinguishing configurations of nondeterministic EFSMs.
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Acknowledgments
The authors would like to thank Dr. Paulo Borba and the anonymous reviewers for their help in improving the paper.
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Authors’ contributions
KEL worked on the proposed methods, examples, and on drafting the paper. NY worked on methods, verifying examples, and drafting the paper. MB worked on the methods and on related examples. SBS worked on drafting the paper and verifying the proposed work. All authors read and approved the final manuscript.
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Keywords
 Model based conformance testing
 Mutation testing
 Model transformation
 Extended finite state machines
 Predicate abstraction
 Distinguishing sequences