Automata, Languages and Machines, Vol. A.
Academic Press, London.The X in "X-machine" represents the fundamental data type on which the machine operates; for example, a machine that operates on databases (objects of type database) would be a database-machine. The X-machine model is structurally the same as the finite state machine, except that the symbols used to label the machine's transitions denote relations of type X→X. Crossing a transition is equivalent to applying the relation that labels it (computing a set of changes to the data type X), and traversing a path in the machine corresponds to applying all the associated relations, one after the other.
Interest in the X-machine was revived in the late 1980s by Mike Holcombe name="Hol88a">M. Holcombe (1988)
'X-machines as a basis for dynamic system specification',
Software Engineering Journal 3(2), pp. 69-76., who noticed that the model was ideal for software formal specification purposes, because it cleanly separates control flow from processing. Provided one works at a sufficiently abstract level, the control flows in a computation can usually be represented as a finite state machine, so to complete the X-machine specification all that remains is to specify the processing associated with each of the machine's transitions. The structural simplicity of the model makes it extremely flexible; other early illustrations of the idea included Holcombe's specification of human-computer interfaces,
name="Hol88b">M. Holcombe (1988)
'Formal methods in the specification of the human-machine interface',
International J. Command and Control, Communications and Info. Systems. 2, pp. 24-34.
his modelling of processes in cell biochemistry, name="Hol86">M. Holcombe (1986)
'Mathematical models of cell biochemistry'.
Technical Report CS-86-4, Dept of Computer Science, Sheffield University.
and Stannett's modelling of decision-making in military command systems name="Sta87">M. Stannett (1987)
'An organisational approach to decision-making in command systems.'
International J. Command and Control, Communications and Info. Systems. 1, pp. 23-34..
X-machines have received renewed attention since the mid-1990s, when Gilbert Laycock's deterministic Stream X-Machine was found to serve as the basis for specifying large software systems that are completely testable name="HI98">M. Holcombe and F. Ipate (1998)
Correct Systems - Building a Business Process Solution.
Springer, Applied Computing Series.. Another variant,
the Communicating Stream X-Machine offers a useful testable model for biological processes
and future swarm-based satellite systems
M. G. Hinchey, C. A. Rouff, J. L. Rash and W. F. Truszkowski (2005)
'Requirements of an Integrated Formal Method for Intelligent Swarms',
in Proceedings of FMICS'05, September 5–6, 2005, Lisbon, Portugal.
Association for Computing Machinery, pp. 125-133.
Eilenberg's original X-machine was a completely general theoretical model of computation (subsuming the Turing machine, for example), which admitted deterministic, non-deterministic and non-terminating computations. His seminal work published many variants of the basic X-machine model, each of which generalized the finite state machine in a slightly different way.
In the most general model, an X-machine is essentially a "machine for manipulating objects of type X". Suppose that X is some datatype, called the fundamental datatype, and that Φ is a set of (partial) relations φ: X → X. An X-machine is a finite state machine whose arrows are labelled by relations in Φ. In any given state, one or more transitions may be enabled if the domain of the associated relation φi accepts (a subset of) the current values stored in X. In each cycle, all enabled transitions are assumed to be taken. Each recognised path through the machine generates a list φ1 ... φn of relations. We call the composition φ1 o ... o φn of these relations the path relation corresponding to that path. The behaviour of the X-machine is defined to be the union of all the behaviours computed by its path relations. In general, this is non-deterministic, since applying any relation computes a set of outcomes on X. In the formal model, all possible outcomes are considered together, in parallel.
For practical purposes, an X-machine should describe some finite computation. An encoding function α: Y → X converts from some input data type Y into the initial state of X, and a decoding function β: X → Z, converts back from the final state(s) of X into some output data type Z. Once the initial state of X is populated, the X-machine runs to completion, and the outputs are then observed. In general, a machine may deadlock (be blocked), or livelock (never halt), or perform one or more complete computations. For this reason, more recent research has focused on deterministic X-machines, whose behaviour can be controlled and observed more precisely.
A compiler with a peep-hole optimizer can be thought of as a machine for optimizing program structure. In this Optimizer-machine, the encoding function α takes source code from the input-type Y (the program source) and loads it into the memory-type X (a parse tree). Suppose that the machine has several states, called FindIncrements, FindSubExprs and Completed. The machine starts in the initial state FindIncrements, which is linked to other states via the transitions:
FindIncrements →DoIncrement FindIncrements
FindIncrements →SkipIncrement FindSubExprs
FindSubExprs →DoSubExpr FindSubExprs
FindSubExprs →SkipSubExpr Completed
The relation DoIncrement maps a parsed subtree corresponding to "x := x + 1" into the optimized subtree "++x". The relation DoSubExpr maps a parse tree containing multiple occurrences of the same expression "x + y ... x + y" into an optimized version with a local variable to store the repeated computation "z := x + y; ... z ... z". These relations are only enabled if X contains the domain values (subtrees) on which they operate. The remaining relations SkipIncrement and SkipSubExpr are nullops (identity relations) enabled in the complementary cases.
So, the Optimizer-machine will run to completion, first converting trivial additions into in-place increments (while in the FindIncrements state), then it will move on to the FindSubExprs state and perform a series of common sub-expression removals, after which it will move to the final state Completed. The decoding function β will then map from the memory-type X (the optimized parse-tree) into the output-type Z (optimized machine code).
When referring to Eilenberg's original model, "X-machine" is typically written with a lower-case "m", because the sense is "any machine for processing X". When referring to later specific models, the convention is to use a capital "M" as part of the proper name of that variant.
The X-machine is rarely encountered in its original form, but underpins several subsequent models of computation. The most influential model on theories of software testing has been the Stream X-Machine. NASA has recently discussed using a combination of Communicating Stream X-Machines and the process calculus WSCSS in the design and testing of swarm satellite systems.
The earliest variant, the continuous-time Analog X-Machine (AXM), was introduced by Mike Stannett in 1990 as a potentially "super-Turing" model of computation;
it is consequently related to work in hypercomputation theory. name="Cop02">B. J. Copeland (2002)
Minds and Machines 12, pp. 461-502.
The most commonly encountered X-machine variant is Gilbert Laycock's 1993 Stream X-Machine (SXM) model, which forms the basis for Mike Holcombe and Florentin Ipate's theory of complete software testing, which guarantees known correctness properties, once testing is over. The Stream X-Machine differs from Eilenberg's original model, in that the fundamental data type X = Out* × Mem × In*, where In* is an input sequence, Out* is an output sequence, and Mem is the (rest of the) memory.
The advantage of this model is that it allows a system to be driven, one step at a time, through its states and transitions, while observing the outputs at each step. These are witness values, that guarantee that particular functions were executed on each step. As a result, complex software systems may be decomposed into a hierarchy of Stream X-Machines, designed in a top-down way and tested in a bottom-up way. This divide-and-conquer approach to design and testing is backed by Florentin Ipate's proof of correct integration, which proves how testing the layered machines independently is equivalent to testing the composed system.
This influential X-machine variant is discussed in more detail on a separate page.
The earliest proposal for connecting several X-machines in parallel is Judith Barnard's 1995 Communicating X-machine (CXM or COMX) model, name="BTWM95">J. Barnard, C. Theaker, J. Whitworth and M. Woodward (1995) 'Real-time communicating X-machines for the formal design of real-time systems', in Proceedings of DARTS '95, Universite Libre, Brussels, Belgium, 9-11 November 2005
name="Bar96">J. Barnard (1996)
COMX: A methodology for the formal design of computer systems using Communicating X-machines.
PhD Thesis, Staffordshire University.
in which machines are connected via named communication channels (known as ports); this model exists in both discrete- and real-timed variants. name="AldBarn97">A. Alderson and J. Barnard (1997)
'On Making a Crossing Safe',
Technical Report SOCTR/97/01, School of Computing, Staffordshire University.
A similar Communicating X-Machine approach using buffered channels was developed by Petros Kefalas. The focus of this work was on expressiveness in the composition of components. The ability to reassign channels meant that some of the testing theorems from Stream X-Machines did not carry over.
These variants are discussed in more detail on a separate page.
The first fully formal model of concurrent X-machine composition was proposed in 1999 by Cristina Vertan and Horia Georgescu, based on earlier work on communicating automatata by Philip Bird and Anthony Cowling. name="BC94">P. R. Bird and A. J. Cowling (1994)
'Modelling logic programming using a network of communicating machines', in
Proc. 2nd Euromicro Workshop on Parallel and Distributed Processing, Malaga, 26-28 January 1994, pp. 156-161.
In Vertan's model, the machines communicate indirectly, via a shared communication matrix (essentially an array of pigeonholes), rather than directly via shared channels.
Bălănescu, Cowling, Georgescu, Vertan and others have studied the formal properties of this CSXM model in some detail. Full input/output relations can be shown. The communication matrix establishes a protocol for synchronous communication. The advantage of this is that it decouples each machine's processing from their communication, allowing the separate testing of each behaviour. This compositional model was proven equivalent to a standard Stream X-Machine, so leveraging the earlier testing theory developed by Holcombe and Ipate.
This X-machine variant is discussed in more detail on a separate page.
Kirill Bogdanov and Anthony Simons developed several variants of the X-machine to model the behaviour of objects in object-oriented systems. This model differs from the Stream X-Machine approach, in that the monolithic data type X is distributed over, and encapsulated by, several objects, which are serially composed; and systems are driven by method invocations and returns, rather than by inputs and outputs. Further work in this area concerned adapting the formal testing theory in the context of inheritance, which partitions the state-space of the superclass in extended subclass objects.
A "CCS-augmented X-machine" (CCSXM) model was later developed by Simons and Stannett in 2002 to support complete behavioural testing of object-oriented systems, in the presence of asynchronous communication name="SS02">M. Stannett and A. J. H. Simons (2002)
Technical Report CS-2002-04, Department of Computer Science, Sheffield University, UK. This is expected to bear some similarity with NASA's recent proposal; but no definitive comparison of the two models has as yet been conducted.
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