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Theorem 4.7 from the last chapter saying that for finitary processes the preorders
pmay
pmust
pmust
. We will proceed in two steps:
finite processes are considered in this chapter and finitary processes, which may
have loops, are dealt with in Chap. 6.
We will first introduce the syntax and operational semantics of the language
pCSP
and then instantiate the general testing framework in Sect. 4.1 to
pCSP
processes.
In Sect.
5.5
we use the transitions
s
and
coincide with
pmay
and
ʱ
−ₒ
ʔ
to define two coinductive preorders,
the
forward simulation
(or simply called
simulation
) preorder
S
[
7
,
8
], and the
FS
over
pCSP
processes. The latter extends the failure
simulation preorder of [
9
] to probabilistic processes. Both preorders use a natural
generalisation of the transitions, first to take the form
ʔ
failure simulation
preorder
ʱ
−ₒ
ʔ
, and then to
weak
ʱ
⃒
ʔ
. The second preorder differs from the first one in the use of a
failure
predicate
s
versions
ʔ
X
−ₒ
, indicating that in the state
s
none of the actions in
X
can be
performed.
Both preorders are preserved by all the operators in
pCSP
, and are
sound
with
respect to the testing preorders; that is
P
S
Q
implies
P
pmay
Q
and
P
FS
Q
implies
P
pmust
Q
. The soundness is proved in a very standard method. But
completeness
,
that the testing preorders imply the respective simulation preorders, requires some
ingenuity. We prove it indirectly, involving a characterisation of the testing and
simulation preorders in terms of a modal logic.
Our modal logic, defined in Sect.
5.6
, uses conjunction
˕
1
∧
˕
2
, the modality
˕
from the Hennessy-Milner Logic, and a probabilistic construct
˕
1
p
↕
˕
2
.A
satisfaction relation between processes and formulae then gives, in a natural manner,
a
logical preorder
between processes:
P
a
L
Q
means that every
L
formula satisfied
L
coincides with
S
(and hence
pmay
by
P
is also satisfied by
Q
. We establish that
also).
To capture failures, we add, for every set of actions
X
, a formula
ref
(
X
)toour
logic, satisfied by any process that, after it can do no further internal actions, can
perform none of the actions in
X
either. The constructs
,
and
ref
stem from
the modal characterisation of the nonprobabilistic failure simulation preorder, given
in [
9
]. We show that
a
pmust
, as well as
FS
, can be characterised in a similar manner
with this extended modal logic.
We prove these characterisation results through two cycles of inclusions:
L
ↆ
S
ↆ
pmay
=
pmay
ↆ
L
F
pmust
ↆ
F
Sect.
5.6
ↆ
FS
ↆ
pmust
=
Sect.
5.5
Sect. 4.1
Sect. 4.7
Sect.
5.7
L
Q
implies
P
In Sect.
5.6
we show that
P
S
Q
(and hence
P
pmay
Q
), and likewise
FS
; the proof involves constructing, for each
pCSP
process
P
,a
characteristic formula ˕
P
. To obtain the other direction, in Sect.
5.7
we show how
every modal formula
˕
can be captured, in some sense, by a test
T
˕
; essentially the
ability of a
pCSP
process to satisfy
˕
is determined by its ability to pass the test
T
˕
.
F
for
and
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