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Local climate change experts applauded President Barack Obama's signing an executive order Friday directing federal agencies to take steps to help the nation adapt to the effects of climate change, signaling an acknowledgment that dramatic transformation in the global environment is inevitable.
But even in doing so, their remarks reflected a belief that the problem is so broad and complex that any one step is hardly cause for celebration.
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"But it deals with climate preparedness and resilience primarily, so it's only dealing with a part of the problem," he added. "This order doesn't deal with mitigation, or trying to find out in any way, shape or form how the federal government might reduce greenhouse gas emissions."
Previously, the Obama administration had set a national goal of reducing carbon emissions 17 percent from 2005 levels by 2020, a goal it has not stepped back from.
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The White House action came the same day as the release of a new study led by a Boulder-based researcher which shows that each degree Fahrenheit of warming in the Salt Lake City region could spell a 1.8 to 6.5 percent drop in the annual streamflow providing water to that area.
The study's lead author was Tim Bardsley, the Utah liaison and hydrologist with Western Water Assessment at the Cooperative Institute for Research in Environmental Sciences at the University of Colorado.
"I think that's great," Bardsley said of Obama's order. "There needs to be leadership on climate change and climate change adaptation now, coming from the highest level. Certainly, it's a very good thing for the process."
Bardsley said Salt Lake City is actively planning now, using tools including his study's results, for the changes that may be in store for its water-supply future. Salt Lake City Mayor Ralph Becker was among those named Friday to the new climate change task force.
"I think what we're seeing, specifically here in Utah, is that it's not too little, too late," Bardsley said. "Salt Lake City is in a position, after this study and follow-up work with this study, to understand the impacts (of climate change) and plan for it."
Kristen Averyt, director of Western Water Assessment at CIRES, said WWA is one of 11 entities funded by Boulder's National Oceanic and Atmospheric Administration to bring climate change science to bear on policy making. She cited as an example its upcoming assessment on the effect of climate change on Colorado, in collaboration with the Colorado Water Conservation Board.
"Just the fact that we're able to think about the broad scope of potential futures will help us in climate preparedness," Averyt said after the White House announcement.
"I think it's really encouraging to see the federal government recognize that people at every different level are looking for help, about how to move forward and how to prepare for what may or may not come in the future."
Tad Pfeffer, a fellow at CU's Institute of Arctic and Alpine Research and a professor of civil, environmental and architectural engineering at CU, said in an email that the order appears to be a positive step forward — or at least has that potential.
"I like the fact that the Task Force's mission is focused on adaptation and building resilience, rather than taking on the most contentious top-level issues — reducing atmospheric CO2 being the most top-level among them," Pfeffer wrote.
"This simpler strategy has somewhat better prospects for success: any argument against the goals of the task force essentially requires a denial that environmental change is even occurring," he said.
In his email, Pfeffer also wrote, "Whether this stands any chance of survival and functioning as planned remains to be seen, but Obama's headed in the right direction in my view, and I'd certainly be willing to help advance their cause."
Contact Camera Staff Writer Charlie Brennan at 303-473-1327 or firstname.lastname@example.com.

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Major Section: ACL2-TUTORIAL
This section contains introductory material on ACL2 including what ACL2 is, how to get started using the system, how to read the output, and other introductory topics. It was written almost entirely by Bill Young of Computational Logic, Inc.
You might also find CLI Technical Report 101 helpful, especially if you are familiar with Nqthm. If you would like more familiarity with Nqthm, we suggest CLI Technical Report 100.
ACL2 is an automated reasoning system developed (for the first 9 years) at Computational Logic, Inc. and (from January, 1997) at the University of Texas at Austin. It is the successor to the Nqthm (or Boyer-Moore) logic and proof system and its Pc-Nqthm interactive enhancement. The acronym ACL2 actually stands for ``A Computational Logic for Applicative Common Lisp''. This title suggests several distinct but related aspects of ACL2.
We assume that readers of the ACL2 documentation have at least a very slight familiarity with some Lisp-like language. We will address the issue of prerequisites further, in ``ABOUT THIS TUTORIAL'' below.
As a logic, ACL2 is a formal system with rigorously defined syntax and semantics. In mathematical parlance, the ACL2 logic is a first-order logic of total recursive functions providing mathematical induction on the ordinals up to epsilon-0 and two extension principles: one for recursive definition and one for constrained introduction of new function symbols, here called encapsulation. The syntax of ACL2 is that of Common Lisp; ACL2 specifications are ``also'' Common Lisp programs in a way that we will make clear later. In less formal language, the ACL2 logic is an integrated collection of rules for defining (or axiomatizing) recursive functions, stating properties of those functions, and rigorously establishing those properties. Each of these activities is mechanically supported.
As a specification language, ACL2 supports modeling of systems of various kinds. An ACL2 function can equally be used to express purely formal relationships among mathematical entities, to describe algorithms, or to capture the intended behavior of digital systems. For digital systems, an ACL2 specification is a mathematical model that is intended to formalize relevant aspects of system behavior. Just as physics allows us to model the behavior of continuous physical systems, ACL2 allows us to model digital systems, including many with physical realizations such as computer hardware. As early as the 1930's Church, Kleene, Turing and others established that recursive functions provide an expressive formalism for modeling digital computation. Digital computation should be understood in a broad sense, covering a wide variety of activities including almost any systematic or algorithmic activity, or activity that can be reasonably approximated in that way. This ranges from the behavior of a digital circuit to the behavior of a programming language compiler to the behavior of a controller for a physical system (as long as the system can be adequately modeled discretely). All of these have been modeled using ACL2 or its predecessor Nqthm.
ACL2 is a computational logic in at least three distinct senses. First, the theory of recursive functions is often considered the mathematics of computation. Church conjectured that any ``effective computation'' can be modeled as a recursive function. Thus, ACL2 provides an expressive language for modeling digital systems. Second, many ACL2 specifications are executable. In fact, recursive functions written in ACL2 are Common Lisp functions that can be submitted to any compliant Common Lisp compiler and executed (in an environment where suitable ACL2-specific macros and functions are defined). Third, ACL2 is computational in the sense that calculation is heavily integrated into the reasoning process. Thus, an expression with explicit constant values but no free variables can be simplified by calculation rather than by complex logical manipulations.
ACL2 is a powerful, automated theorem prover or proof checker. This means that a competent user can utilize the ACL2 system to discover proofs of theorems stated in the ACL2 logic or to check previously discovered proofs. The basic deductive steps in an ACL2-checked proof are often quite large, due to the sophisticated combination of decision procedures, conditional rewriting, mathematical and structural induction, propositional simplification, and complex heuristics to orchestrate the interactions of these capabilities. Unlike some automated proof systems, ACL2 does not produce a formal proof. However, we believe that if ACL2 certifies the ``theoremhood'' of a given conjecture, then such a formal proof exists and, therefore, the theorem is valid. The ultimate result of an ACL2 proof session is a collection of ``events,'' possibly grouped into ``books,'' that can be replayed in ACL2. Therefore, a proof can be independently validated by any ACL2 user.
ACL2 may be used in purely automated mode in the shallow sense that conjectures are submitted to the prover and the user does not interact with the proof attempt (except possibly to stop it) until the proof succeeds or fails. However, any non-trivial proof attempt is actually interactive, since successful proof ``events'' influence the subsequent behavior of the prover. For example, proving a lemma may introduce a rule that subsequently is used automatically by the prover. Thus, any realistic proof attempt, even in ``automatic'' mode, is really an interactive dialogue with the prover to craft a sequence of events building an appropriate theory and proof rules leading up to the proof of the desired result. Also, ACL2 supports annotating a theorem with ``hints'' designed to guide the proof attempt. By supplying appropriate hints, the user can suggest proof strategies that the prover would not discover automatically. There is a ``proof-tree'' facility (see proof-tree) that allows the user to monitor the progress and structure of a proof attempt in real-time. Exploring failed proof attempts is actually where heavy-duty ACL2 users spend most of their time.
ACL2 can also be used in a more explicitly interactive mode. The ``proof-checker'' subsystem of ACL2 allows exploration of a proof on a fairly low level including expanding calls of selected function symbols, invoking specific rewrite rules, and selectively navigating around the proof. This facility can be used to gain sufficient insight into the proof to construct an automatic version, or to generate a detailed interactive-style proof that can be replayed in batch mode.
Because ACL2 is all of these things -- computational logic, specification language, programming system, and theorem prover -- it is more than the sum of its parts. The careful integration of these diverse aspects has produced a versatile automated reasoning system suitable for building highly reliable digital systems. In the remainder of this tutorial, we will illustrate some simple uses of this automated reasoning system.
ACL2 is a complex system with a vast array of features, bells and whistles. However, it is possible to perform productive work with the system using only a small portion of the available functionality. The goals of this tutorial are to:
familiarize the new user with the most basic features of and modes of interaction with ACL2;
familiarize her with the form of output of the system; and
work through a graduated series of examples.
The more knowledge the user brings to this system, the easier it will be to become proficient. On one extreme: the ideal user of ACL2 is an expert Common Lisp programmer, has deep understanding of automated reasoning, and is intimately familiar with the earlier Nqthm system. Such ideal users are unlikely to need this tutorial. However, without some background knowledge, the beginning user is likely to become extremely confused and frustrated by this system. We suggest that a new user of ACL2 should:
(a) have a little familiarity with Lisp, including basic Lisp programming and prefix notation (a Lisp reference manual such as Guy Steele's ``Common Lisp: The Language'' is also helpful);
(b) be convinced of the utility of formal modeling; and
(c) be willing to gain familiarity with basic automated theorem proving topics such as rewriting and algebraic simplification.
We will not assume any deep familiarity with Nqthm (the so-called ``Boyer-Moore Theorem Prover''), though the book ``A Computational Logic Handbook'' by Boyer and Moore (Academic Press, 1988) is an extremely useful reference for many of the topics required to become a competent ACL2 user. We'll refer to it as ACLH below.
As we said in the introduction, ACL2 has various facets. For example, it can be used as a Common Lisp programming system to construct application programs. In fact, the ACL2 system itself is a large Common Lisp program constructed almost entirely within ACL2. Another use of ACL2 is as a specification and modeling tool. That is the aspect we will concentrate on in the remainder of this tutorial.
This section is an abridged version of what's available elsewhere; feel free to see startup for more details.
How you start ACL2 will be system dependent, but you'll probably type something like ``acl2'' at your operating system prompt. Consult your system administrator for details.
When you start up ACL2, you'll probably find yourself inside the ACL2 command loop, as indicated by the following prompt.
If not, you should type
(LP). See lp, which has a lot more
information about the ACL2 command loop.
There are two ``modes'' for using ACL2,
logic and
program. When you begin ACL2, you will ordinarily be in the
logic mode. This means that any new function defined is not
only executable but also is axiomatically defined in the ACL2 logic.
(See defun-mode and see default-defun-mode.) Roughly
program mode is available for using ACL2 as a
programming language without some of the logical burdens
necessary for formal reasoning. In this tutorial we will assume
that we always remain in
logic mode and that our purpose is
to write formal models of digital systems and to reason about them.
Now, within the ACL2 command loop you can carry out various kinds of activities, including the folllowing. (We'll see examples later of many of these.)
define new functions (see defun);
execute functions on concrete data;
pose and attempt to prove conjectures about previously defined functions (see defthm);
query the ACL2 ``world'' or database (e.g., see pe); and
numerous other things.
In addition, there is extensive on-line documentation, of which this tutorial introduction is a part.
The standard means of interacting with ACL2 is to submit a sequence
of forms for processing by the ACL2 system. These forms are checked
for syntactic and semantic acceptability and appropriately processed
by the system. These forms can be typed directly at the ACL2
prompt. However, most successful ACL2 users prefer to do their work
using the Emacs text editor, maintaining an Emacs ``working'' buffer
in which forms are edited. Those forms are then copied to the ACL2
interaction buffer, which is often the
"*shell*" buffer.
In some cases, processing succeeds and makes some change to the ACL2 ``logical world,'' which affects the processing of subsequent forms. How can this processing fail? For example, a proposed theorem will be rejected unless all function symbols mentioned have been previously defined. Also the ability of ACL2 to discover the proof of a theorem may depend on the user previously having proved other theorems. Thus, the order in which forms are submitted to ACL2 is quite important. Maintaining forms in an appropriate order in your working buffer will be helpful for re-playing the proof later.
One of the most common events in constructing a model is
introducing new functions. New functions are usually introduced
using the
defun form; we'll encounter some exceptions later.
Proposed function definitions are checked to make sure that they are
syntactically and semantically acceptable (e.g., that all mentioned
functions have been previously defined) and, for recursive
functions, that their recursive calls terminate. A recursive
function definition is guaranteed to terminate if there is some some
``measure'' of the arguments and a ``well-founded'' ordering such
that the arguments to the function get smaller in each recursive
call. See well-founded-relation.
For example, suppose that we need a function that will append two
lists together. (We already have one in the ACL2
function; but suppose perversely that we decide to define our own.)
Suppose we submit the following definition (you should do so as well
and study the system output):
The system responds with the following message:
(defun my-app (x y) (if (atom x) y (cons (car x) (my-app x y))))
This means that the system could not find an expression involving the formal parameters
ACL2 Error in ( DEFUN MY-APP ...): No :MEASURE was supplied with the definition of MY-APP. Our heuristics for guessing one have not made any suggestions. No argument of the function is tested along every branch and occurs as a proper subterm at the same argument position in every recursive call. You must specify a :MEASURE. See :DOC defun.
x and
y that decreases under some
well-founded order in every recursive call (there is only one such
call). It should be clear that there is no such measure in this
case because the only recursive call doesn't change the arguments at
all. The definition is obviously flawed; if it were accepted and
executed it would loop forever. Notice that a definition that is
rejected is not stored in the system database; there is no need to
take any action to have it ``thrown away.'' Let's try again with
the correct definition. The interaction now looks like (we're also
putting in the ACL2 prompt; you don't type that):
Notice that this time the function definition was accepted. We didn't have to supply a measure explicitly; the system inferred one from the form of the definition. On complex functions it may be necessary to supply a measure explicitly. (See xargs.)
ACL2 !>(defun my-app (x y) (if (atom x) y (cons (car x) (my-app (cdr x) y))))
The admission of MY-APP is trivial, using the relation O< (which is known to be well-founded on the domain recognized by O-P) and the measure (ACL2-COUNT X). We observe that the type of MY-APP is described by the theorem (OR (CONSP (MY-APP X Y)) (EQUAL (MY-APP X Y) Y)). We used primitive type reasoning.
Summary Form: ( DEFUN MY-APP ...) Rules: ((:FAKE-RUNE-FOR-TYPE-SET NIL)) Warnings: None Time: 0.07 seconds (prove: 0.00, print: 0.00, other: 0.07) MY-APP
The system output provides several pieces of information.
The revised definition is acceptable. The system realized that there is a particular measure (namely,
(acl2-count x)) and a well-founded relation (
o<) under which the arguments of
my-appget smaller in recursion. Actually, the theorem prover proved several theorems to admit
my-app. The main one was that when
(atom x)is false the
(cdr x)is less than (in the
o<sense) the
Acl2-countis the most commonly used measure of the ``size`` of an ACL2 object.
o<is the ordering relation on ordinals less than epsilon-0. On the natural numbers it is just ordinary ``<''.
The observation printed about ``the type of MY-APP'' means that calls of the function
my-appwill always return a value that is either a cons pair or is equal to the second parameter.
The summary provides information about which previously introduced definitions and lemmas were used in this proof, about some notable things to watch out for (the Warnings), and about how long this event took to process.
Usually, it's not important to read this information. However, it is a good habit to scan it briefly to see if the type information is surprising to you or if there are Warnings. We'll see an example of them later.
After a function is accepted, it is stored in the database and
available for use in other function definitions or lemmas. To see
the definition of any function use the
pe command
(see pe). For example,
This displays the definition along with some other relevant information. In this case, we know that this definition was processed in
ACL2 !>:pe my-app L 73:x(DEFUN MY-APP (X Y) (IF (ATOM X) Y (CONS (CAR X) (MY-APP (CDR X) Y))))
logic mode (the ``
L'') and was the 73rd command
processed in the current session.
We can also try out our newly defined function on some sample data. To do that, just submit a form to be evaluated to ACL2. For example,
ACL2 !>(my-app '(0 1 2) '(3 4 5)) (0 1 2 3 4 5) ACL2 !>(my-app nil nil) NIL ACL2 !>
Now suppose we want to prove something about the function just
introduced. We conjecture, for example, that the length of the
append of two lists is the sum of their lengths. We can formulate
this conjecture in the form of the following ACL2
defthm form.
First of all, how did we know about the functions
(defthm my-app-length (equal (len (my-app x y)) (+ (len x) (len y))))
len and
+, etc.?
The answer to that is somewhat unsatisfying -- we know them from our
past experience in using Common Lisp and ACL2. It's hard to know
that a function such as
len exists without first knowing some Common
Lisp. If we'd guessed that the appropriate function was called
length (say, from our knowledge of Lisp) and tried
:pe length, we
would have seen that
length is defined in terms of
len, and we
could have explored from there. Luckily, you can write a lot of
ACL2 functions without knowing too many of the primitive functions.
Secondly, why don't we need some ``type'' hypotheses? Does it make
sense to append things that are not lists? Well, yes. ACL2 and
Lisp are both quite weakly typed. For example, inspection of the
definition of
my-app shows that if
x is not a cons pair, then
(my-app x y) always returns
y, no matter what
y is.
Thirdly, would it matter if we rewrote the lemma with the equality reversed, as follows?
The two are logically equivalent, but...yes, it would make a big difference. Recall our remark that a lemma is not only a ``fact'' to be proved; it also is used by the system to prove other later lemmas. The current lemma would be stored as a rewrite rule. (See rule-classes.) For a rewrite rule, a conclusion of the form
(defthm my-app-length2 (equal (+ (len x) (len y)) (len (my-app x y)))).
(EQUAL LHS RHS) means to replace instances of the
LHS by the
appropriate instance of the
RHS. Presumably, it's better to rewrite
(len (my-app x y)) to
(+ (len x) (len y)) than the other way around.
The reason is that the system ``knows'' more about
+ than it does
about the new function symbol
So let's see if we can prove this lemma. Submitting our preferred
defthm to ACL2 (do it!), we get the following interaction:
-------------------------------------------------- ACL2 !>(defthm my-app-length (equal (len (my-app x y)) (+ (len x) (len y))))
Name the formula above *1.
Perhaps we can prove *1 by induction. Three induction schemes are suggested by this conjecture. These merge into two derived induction schemes. However, one of these is flawed and so we are left with one viable candidate.
We will induct according to a scheme suggested by (LEN X), but modified to accommodate (MY-APP X Y). If we let (:P X Y) denote *1 above then the induction scheme we'll use is (AND (IMPLIES (NOT (CONSP X)) (:P X Y)) (IMPLIES (AND (CONSP X) (:P (CDR X) Y)) (:P X Y))). This induction is justified by the same argument used to admit LEN, namely, the measure (ACL2-COUNT X) is decreasing according to the relation O< (which is known to be well-founded on the domain recognized by O-P). When applied to the goal at hand the above induction scheme produces the following two nontautological subgoals.
Subgoal *1/2 (IMPLIES (NOT (CONSP X)) (EQUAL (LEN (MY-APP X Y)) (+ (LEN X) (LEN Y)))).
But simplification reduces this to T, using the :definitions of FIX, LEN and MY-APP, the :type-prescription rule LEN, the :rewrite rule UNICITY-OF-0 and primitive type reasoning.
Subgoal *1/1 (IMPLIES (AND (CONSP X) (EQUAL (LEN (MY-APP (CDR X) Y)) (+ (LEN (CDR X)) (LEN Y)))) (EQUAL (LEN (MY-APP X Y)) (+ (LEN X) (LEN Y)))).
This simplifies, using the :definitions of LEN and MY-APP, primitive type reasoning and the :rewrite rules COMMUTATIVITY-OF-+ and CDR-CONS, to
Subgoal *1/1' (IMPLIES (AND (CONSP X) (EQUAL (LEN (MY-APP (CDR X) Y)) (+ (LEN Y) (LEN (CDR X))))) (EQUAL (+ 1 (LEN (MY-APP (CDR X) Y))) (+ (LEN Y) 1 (LEN (CDR X))))).
But simplification reduces this to T, using linear arithmetic, primitive type reasoning and the :type-prescription rule LEN.
That completes the proof of *1.
Summary Form: ( DEFTHM MY-APP-LENGTH ...) Rules: ((:REWRITE UNICITY-OF-0) (:DEFINITION FIX) (:REWRITE COMMUTATIVITY-OF-+) (:DEFINITION LEN) (:REWRITE CDR-CONS) (:DEFINITION MY-APP) (:TYPE-PRESCRIPTION LEN) (:FAKE-RUNE-FOR-TYPE-SET NIL) (:FAKE-RUNE-FOR-LINEAR NIL)) Warnings: None Time: 0.30 seconds (prove: 0.13, print: 0.05, other: 0.12) MY-APP-LENGTH --------------------------------------------------
Wow, it worked! In brief, the system first tried to rewrite and simplify as much as possible. Nothing changed; we know that because it said ``Name the formula above *1.'' Whenever the system decides to name a formula in this way, we know that it has run out of techniques to use other than proof by induction.
The induction performed by ACL2 is structural or ``Noetherian''
induction. You don't need to know much about that except that it is
induction based on the structure of some object. The heuristics
infer the structure of the object from the way the object is
recursively decomposed by the functions used in the conjecture. The
heuristics of ACL2 are reasonably good at selecting an induction
scheme in simple cases. It is possible to override the heuristic
choice by providing an
:induction hint (see hints). In the
case of the theorem above, the system inducts on the structure of
x as suggested by the decomposition of
x in both
(my-app x y)
(len x). In the base case, we assume that
x is not a
consp. In the inductive case, we assume that it is a
and assume that the conjecture holds for
(cdr x).
There is a close connection between the analysis that goes on when a
function like
my-app is accepted and when we try to prove
something inductively about it. That connection is spelled out well
in Boyer and Moore's book ``A Computational Logic,'' if you'd like to
look it up. But it's pretty intuitive. We accepted
because the ``size'' of the first argument
x decreases in the
recursive call. That tells us that when we need to prove something
inductively about
my-app, it's a good idea to try an induction on
the size of the first argument. Of course, when you have a theorem
involving several functions, it may be necessary to concoct a more
complicated induction schema, taking several of them into account.
That's what's meant by ``merging'' the induction schemas.
The proof involves two cases: the base case, and the inductive case.
You'll notice that the subgoal numbers go down rather than up,
so you always know how many subgoals are left to process. The base
case (
Subgoal *1/2) is handled by opening up the function
definitions, simplifying, doing a little rewriting, and performing
some reasoning based on the types of the arguments. You'll often
encounter references to system defined lemmas (like
unicity-of-0). You can always look at those with
pe; but,
in general, assume that there's a lot of simplification power under
the hood that's not too important to understand fully.
The inductive case (
Subgoal *1/1) is also dispatched pretty
easily. Here we assume the conjecture true for the
cdr of the
list and try to prove it for the entire list. Notice that the
prover does some simplification and then prints out an updated
version of the goal (
Subgoal *1/1'). Examining these gives you a
pretty good idea of what's going on in the proof.
Sometimes one goal is split into a number of subgoals, as happened with the induction above. Sometimes after some initial processing the prover decides it needs to prove a subgoal by induction; this subgoal is given a name and pushed onto a stack of goals. Some steps, like generalization (see ACLH), are not necessarily validity preserving; that is, the system may adopt a false subgoal while trying to prove a true one. (Note that this is ok in the sense that it is not ``unsound.'' The system will fail in its attempt to establish the false subgoal and the main proof attempt will fail.) As you gain facility with using the prover, you'll get pretty good at recognizing what to look for when reading a proof script. The prover's proof-tree utility helps with monitoring an ongoing proof and jumping to designated locations in the proof (see proof-tree). See tips for a number of useful pointers on using the theorem prover effectively.
When the prover has successfully proved all subgoals, the proof is
finished. As with a
defun, a summary of the proof is printed.
This was an extremely simple proof, needing no additional guidance.
More realistic examples typically require the user to look carefully
at the failed proof log to find ways to influence the prover to do
better on its next attempt. This means either: proving some rules
that will then be available to the prover, changing the global state
in ways that will affect the proof, or providing some hints
locally that will influence the prover's behavior. Proving this
lemma (
my-app-length) is an example of the first. Since this is
a rewrite rule, whenever in a later proof an instance of the
(LEN (MY-APP X Y)) is encountered, it will be rewritten to
the corresponding instance of
(+ (LEN X) (LEN Y)). Disabling the
rule by executing the command
is an example of a global change to the behavior of the prover since this rewrite will not be performed subsequently (unless the rule is again enabled). Finally, we can add a (local) disable ``hint'' to a
(in-theory (disable my-app-length)),
defthm, meaning to disable the lemma only in the proof of one
or more subgoals. For example:
(defthm my-app-length-commutativity (equal (len (my-app x y)) (len (my-app y x))) :hints (("Goal" :in-theory (disable my-app-length))))In this case, the hint supplied is a bad idea since the proof is much harder with the hint than without it. Try it both ways.
By the way, to undo the previous event use
:u (see u). To
undo back to some earlier event use
:ubt (see ubt). To view
the current event use
:pe :here. To list several events use
:pbt (see pbt).
Notice the form of the hint in the previous example
(see hints). It specifies a goal to which the hint applies.
"Goal" refers to the top-level goal of the theorem. Subgoals
are given unique names as they are generated. It may be useful to
suggest that a function symbol be disabled only for Subgoal
1.3.9, say, and a different function enabled only on Subgoal
5.2.8. Overuse of such hints often suggests a poor global
proof strategy.
We now recommend that you visit documentation on additional
examples. See tutorial-examples.


text:
Commonwealth Literature and the Modern World
Hena Maes-Jelinek
Librairie Marcel Didier, 1975 - Commonwealth literature (English) - 181 pages
From inside the book
6 pages matching Malcolm Lowry in this book
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African literature Afrikaans Albert Gomes Alfred Mendes Anna Rutherford Antipodean becomes Belgium Bobby and Linda British C. L. R. James Capricornia Caribbean century characters civilization colonial Commonwealth literature creative criticism cultural darkness death Edgar Wright Eliot English essay experience feel fiction Frank Collymore George Lamming Guyana H. I. E. Dhlomo Harris's heart human Ibadan Ibid imagination individual Janet Frame's journey Kyk-over-al language literary living London lover Lowry magazine Malcolm Lowry meaning Melville and Harris Melville's modern myth Naipaul narrative nature Nigerian novel novelists past Peacock Poem poet poetry political published Quartets Queely Radio reader Richard Devine Santosh says sense short story social society South African Susan symbol talk themes Tilted Cross tradition Trinidad University of Liege vision Waiting Room Walcott West Indian literature West Indian writers West Indies whole Wilson Harris Wole Soyinka Xhosa Zulu


text:
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Research Computing
Warp Speed. It's definitely happening here. With the launch of the Cardinal Research Cluster (CRC), the University of Louisville has launched one of the fastest and largest academic supercomputers in Kentucky. The Cardinal Research Cluster could very well be the tool that helps UofL researchers discover a new cure for cancer, come up with a better way to predict tornadoes, determine how to cure diabetes, or discover new ways to go green such as optimizing city energy grids or cutting home heating bills. In other words, the Cardinal Research Cluster will help researchers to create a better life for all of us by providing Louisville's researchers with the most up-to-date research computing tools available.
Developing a strong high-performance computing (HPC) infrastructure in support of research is a priority at the University of Louisville. One component of this research cyberinfrastructure consists of providing an HPC hardware environment with storage, networking, and compute time for use by faculty, students, and staff for research and instructional purposes. A second key component consists of research support services provided by IT staff working closely and collaboratively with university researchers. This vital component will serve to foster a vigorous computational environment that can be tailored to researchers' individual needs. At the same time, the new computing capabilities and support personnel can create opportunities for researchers in diverse disciplines to collaborate with each other in promising new directions that can raise the university's research profile and lead to new avenues of funding.
ALL CRC users are subject to the CRC usage polices at: CRC Usage Policies
Contact us at firstname.lastname@example.com with any questions or for additional information.


text:
Major Section: MISCELLANEOUS
ACL2 must occasionally choose which of two terms is syntactically smaller. The need for such a choice arises, for example, when using equality hypotheses in conjectures (the smaller term is substituted for the larger elsewhere in the formula), in stopping loops in permutative rewrite rules (see loop-stopper), and in choosing the order in which to try to cancel the addends in linear arithmetic inequalities. When this notion of syntactic size is needed, ACL2 uses ``term order.'' Popularly speaking, term order is just a lexicographic ordering on terms. But the situation is actually more complicated.
We define term order only with respect to terms in translated form. See trans. Constants are viewed as built up by pseudo-function applications, as described at the end of this documentation.
Term1 comes before
term2 in the term order iff
The function
(a) the number of variable occurrences in
term1is less than that in
term2, or
(b) the numbers of variable occurrences in the two terms are equal but the number of function applications in
term1is less than that in
term2, or
(c) the numbers of variable occurrences in the two terms are equal, the numbers of functions applications in the two terms are equal, but the number of pseudo-function applications in
term1is less than that in
term2, or
(d) the numbers of variable occurrences in the two terms are equal, the numbers of functions applications in the two terms are equal, the numbers of pseudo-function applications in the two terms are equal, and
term1comes before
term2in a lexicographic ordering,
lexorder, based their structure as Lisp objects: see lexorder.
term-order, when applied to the translations of two
ACL2 terms, returns
t iff the first is ``less than or equal'' to the
second in the term order.
By ``number of variable occurrences'' we do not mean ``number of
distinct variables'' but ``number of times a variable symbol is
(cons x x) has two variable occurrences, not one.
Thus, perhaps counterintuitively, a large term that contains only
one variable occurrence, e.g.,
(standard-char-p (car (reverse x)))
comes before
(cons x x) in the term order.
Since constants contain no variable occurrences and non-constant expressions must contain at least one variable occurrence, constants come before non-constants in the term order, no matter how large the constants. For example, the list constant
'(monday tuesday wednesday thursday friday)comes before
x in the term order. Because term order is involved
in the control of permutative rewrite rules and used to shift
smaller terms to the left, a set of permutative rules designed to
allow the permutation of any two tips in a tree representing the
nested application of some function will always move the constants
into the left-most tips. Thus,
(+ x 3 (car (reverse klst)) (dx i j)) ,which in translated form is
(binary-+ x (binary-+ '3 (binary-+ (dx i j) (car (reverse klst))))),will be permuted under the built-in commutativity rules to
(binary-+ '3 (binary-+ x (binary-+ (car (reverse klst)) (dx i j))))or
(+ 3 x (car (reverse klst)) (dx i j)).Two terms with the same numbers of variable occurrences, function applications, and pseudo-function applications are ordered by lexicographic means, based on their structures. See lexorder. Thus, if two terms
(member ...) and
(reverse ...) contain the same
numbers of variable occurrences and function applications, then the
member term is first in the term order because
member comes before
reverse in the term order (which is here reduced to alphabetic
It remains to discuss the notion of pseudo-function applications.
Clearly, two constants are ordered using cases (c) and (d) of term order, since they each contain 0 variable occurrences and no function calls. This raises the question ``How many function applications are in a constant?'' Because we regard the number of function applications as a more fundamental measure of the size of a constant than lexicographic considerations, we decided that for the purposes of term order, constants would be seen as being built by primitive constructor functions. These constructor functions are not actually defined in ACL2 but merely imagined for the purposes of term order. We here use suggestive names for these imagined functions, ignoring entirely the prior use of these names within ACL2. The imagined applications of these functions are what we refer to as pseudo-function applications.
The constant function
z constructs
0. Positive integers are
constructed from
(z) by the successor function,
s. Thus
2 is
(s (s (z))) and contains three function applications.
contains one hundred and one applications. Negative integers are
constructed from their positive counterparts by
-. Thus,
(- (s (s (z)))) and has four applications. Ratios are
constructed by the dyadic function
/. Thus,
-1/2 is
(/ (- (s (z))) (s (s (z))))and contains seven applications. Complex rationals are similarly constructed from rationals. All character objects are considered primitive and are constructed by constant functions of the same name. Thus
#\a and
#\b both contain one application.
Strings are built from the empty string,
(o) by the
``string-cons'' function written
cs. Thus
"AB" is
(cs (#\a) (cs (#\b) (o))) and contains five applications.
Symbols are obtained from strings by ``packing'' the
with the unary function
p. Thus
'ab is
(p (cs (#\a) (cs (#\b) (o))))and has six applications. Note that packages are here ignored and thus
'acl2::ab and
'my-package::ab each contain just six
applications. Finally, conses are built with
cons, as usual.
'(1 . 2) is
(cons '1 '2) and contains six applications,
'1 contains two and
'2 contains three. This, for better
or worse, answers the question ``How many function applications are
in a constant?''


text:
Samsung Galaxy S III users may feel like their handsets will be rendered antiquated once the purported Galaxy S IV is announced, but rumors indicate that users will have access to some of the same features included in Samsung's forthcoming smartphone.
Leaked screenshots published by SamMobile from the as-of-yet unreleased Android 4.2.1 Galaxy S III update show several features that may come standard with the next Galaxy smartphone. Features like Samsung Smart scroll and Smart pause appear to be available in the update's Settings menu. Smart scroll will reportedly track the user's eye movement and scroll the content on the screen up so that users won't have to swipe. Smart pause will apparently allow a device to pause video when it detects that the user's head is not directly facing the screen. Other screenshots detail the ability to make adjustments to these various features, including how fast the handset should scroll the page and whether the motion sensor should determine vertical head movements for setting the scroll speed.
Though screenshots have apparently leaked on the Galaxy S III's full Android 4.2 update, we've yet to see any official software updates push through. We're expecting to hear more about the Galaxy S IV next week at Samsung's official Mobile Unpacked event.


text:
Protocol Buffers are a serialization format, developed by Google, that is fast and easy to use. Frequently referred to as "Protobuf," the technology consists of a language- and platform-neutral, extensible, binary format for fast data exchange that relies on an interface description language, which is compiled to native code. This article explains how to work with Protobuf technology. In addition, I'll show how to pair Protobuf with Windows Communication Foundation (WCF), which is Microsoft's unified programming model for building service-oriented apps. And I'll demonstrate the benefits of using Protobuf this way.
To work with the code examples listed in this article, you need to have:
- Visual Studio 2010
- Protocol Buffers for .NET (Protobuf-net)
You can freely download a copy of Protocol Buffers for .NET. Before we delve deep into implementing Protobuf WCF services in .NET, let's take a quick tour of the basics of Protobuf services: What are they and how are they used.
Protocol Buffers
The idea behing is Protocol Buffers to provide a platform- and language-independent format for exchanging serialized, structured data. Protocol Buffers are lighter and faster to handle than XML or JSON. The other major advantages of Protocol Buffers are:
- Reduced size of the data packets
- Platform independence
- Extensibility
Creating Protobuf Objects in Visual Studio
Note that all protobuf-net classes are stored in files that have .proto extensions. You can store one or more proto classes in a single .proto file. Visual Studio 2008 and 2010 now have support for creating protobuf-net classes through a custom tool. You can find more information on how the tool works.
To integrate protobuf-net with Visual Studio, follow these steps:
- Copy the ProtoBuf.zip file from
(protobuf-net installation directory)\ItemTemplates\csharp\data\1033into
(VS install location - Microsoft Visual Studio 10.0)\Common7\IDE\ItemTemplates\CSharp\Data\1033
- Open the Visual Studio 2010 Command Prompt in Administrative mode
- Execute the command
"devenv /installvstemplates"
You are now ready to create .proto files from Visual Studio. You can now use the Protocol Buffers template you'll see it in the list of installed templates in your Visual Studio Add New Item dialog as shown in Figure 1.
Figure 1: Creating Protocol Buffer objects in Visual Studio.
Protobuf Messages
To create a Protcol Buffer class (known as a "message" in protobuf), select Add | New Item in the solution explorer window, then select Protocol Buffers from the list of the templates displayed, as in Figure 1.
Here's how a typical protobuf message would look:
package DDJ; message User { required int32 UserID = 1; required string UserName = 2; required string UserEmail = 3; required string Password = 4; optional string PasswordQuestion = 5; optional string PasswordAnswer = 6; }<
Notice the use of the
required attribute in the
User message shown above. This qualifier indicates that the attribute is mandatory. The
optional attributes are used to indicate that the property may or may not contain data. When creating protobuf-net data classes, each of the properties of the class should be explicitly numbered and have a proper ordering.
You would use the
repeated attribute to indicate that the property can contain a list of objects of the same type. For example: Suppose we need to store a history of a user's passwords. To do this, we would need a list. Refer to the
PasswordHistory message as shown below:
package DDJ; message PasswordHistory { required string UserID = 1; required string Password = 2; }
We will now use
PasswordHistory as a repeated attribute in the
User class as shown here:
package DDJ; message User { required int32 UserID = 1; required string UserName = 2; required string UserEmail = 3; required string Password = 4; optional string PasswordQuestion = 5; optional string PasswordAnswer = 6; repeated string PasswordHistory = 7; }
Once you create and use your .proto file in Visual Studio, the protogen compiler automatically generates the code-behind file for your proto message. Here's how a typical automatically generated class looks:
[global::System.Serializable, global::ProtoBuf.ProtoContract([email protected]"AuthenticateUserResponse")] public partial class AuthenticateUserResponse : global::ProtoBuf.IExtensible { public AuthenticateUserResponse() {} private int _StatusCode; [global::ProtoBuf.ProtoMember(1, IsRequired = true, [email protected]"StatusCode", DataFormat = global::ProtoBuf.DataFormat.TwosComplement)] public int StatusCode { get { return _StatusCode; } set { _StatusCode = value; } } private string _StatusMessage = ""; [global::ProtoBuf.ProtoMember(2, IsRequired = false, [email protected]"StatusMessage", DataFormat = global::ProtoBuf.DataFormat.Default)] [global::System.ComponentModel.DefaultValue("")] public string StatusMessage { get { return _StatusMessage; } set { _StatusMessage = value; } } private bool _IsAuthenticated; [global::ProtoBuf.ProtoMember(3, IsRequired = true, [email protected]"IsAuthenticated", DataFormat = global::ProtoBuf.DataFormat.Default)] public bool IsAuthenticated { get { return _IsAuthenticated; } set { _IsAuthenticated = value; } } private global::ProtoBuf.IExtension extensionObject; global::ProtoBuf.IExtension global::ProtoBuf.IExtensible.GetExtensionObject(bool createIfMissing) { return global::ProtoBuf.Extensible.GetExtensionObject(ref extensionObject, createIfMissing); } }
Using Protobuf with WCF Services
Now let's discuss how to use Protobuf technology in WCF services. Once you are done creating a complete application and its projects, the Solution Explorer might look similar to Figure 2.
Figure 2: The Solution Explorer window.
To use protobuf-net with a WCF service, mark your service contract with the
ProtoContract attribute. Here's how a typical Protobuf WCF service contract looks:
[ServiceContract,ProtoBuf.ProtoContract] public interface ISimpleContract { [OperationContract] Boolean IsAuthenticatedUser(User userObj); }
You can also specify that your WCF service should use protobuf-net in the configuration file; more on this later.
Let's implement a sample application that makes use of Protobuf WCF services. To do this, follow these steps:
- Open Visual Studio IDE
- Click on File | New | Project
- Select WCF Service Application from the list of the project types
- Save the WCF Service application project with a name
- Create data contract classes for this service
- Create a service contract and a service implementation class for this service
- Repeat steps 3 and 4 to create another WCF Service application with the same implementation
We'll use the DDJ.Services project shown in Figure 2 for our sample: This is a WCF Service application that makes use of Protobuf technology. The other WCF Service aApplication project (Test.Services) contains the same implementation, but doesn't use Protobuf. I have done this so that we can compare the performance of a Protobuf WCF service against a WCF service that has the same implementation, but doesn't employ Protobuf.
Implementing the Data Contracts
In the DDJ.Services project, I use the following data contract classes:
AuthenticateUserRequest class contains the properties used to authenticate a user. The source for this class is:
/// <summary> /// AuthenticateUserRequest data contract /// </summary> [DataContract] [ProtoContract] public class AuthenticateUserRequest { [DataMember(Order = 0)] [ProtoMember(1)] public Int32 UserID; [DataMember(Order = 1)] [ProtoMember(2)] public String Password; }
AuthenticateUser operation contract returns an instance of the
AuthenticateUserResponse class. The properties of this class include:
StatusMessage, and a Boolean property called
IsAuthenticated that is set to true or false based on whether the user is authenticated. The
AuthenticateUserResponse class follows:
/// <summary> /// AuthenticateUserResponse data contract /// </summary> [DataContract] [ProtoContract] public class AuthenticateUserResponse { [DataMember(Order = 0)] [ProtoMember(1)] public Int32 StatusCode; [DataMember(Order = 1)] [ProtoMember(2)] public String StatusMessage; [DataMember(Order = 2)] [ProtoMember(3)] public Boolean IsAuthenticated; )
User class contains necessary properties relating to the
User entity, such as
UserName, and so on. The
User class is as follows:
/// <summary> /// User data contract /// </summary> [DataContract] [ProtoContract] public class User { [DataMember(Order = 0)] [ProtoMember(1)] public Int32 UserID; [DataMember(Order = 1)] [ProtoMember(2)] public String UserName; [DataMember(Order = 2)] [ProtoMember(3)] public String UserEmail; [DataMember(Order = 3)] [ProtoMember(4)] public String Password; [DataMember(Order = 4)] [ProtoMember(5)] public String FirstName; [DataMember(Order = 5)] [ProtoMember(6)] public String LastName; }
Note the use of the
ProtoMember attribute in each of the properties of these classes. Also note the ordering in each of the attributes.


text:
Presumably pronounced "key," a mobile backend provider called Kii is making noise about its new KiiReferral iOS software designed to give mobile app developers the ability to add social sharing and referral tracking to their apps.
KiiReferral tries to help developers make apps potentially "more viral" (if indeed there are degrees of viral-ness) among social media users. For example, mobile game developers can drop in the KiiReferral framework to allow users to share their game within social networks.
The framework includes an SDK to implement the full functionality in a few lines of code. In addition, developers can introduce creative triggers such as rewards and incentives to accelerate app conversions and downloads.
Kii CEO Masanari Arai says that usually it can take weeks to implement such a system, but now developers can set up social sharing and referral tracking within minutes. "Our Kii developer portal also includes a real-time dashboard showing number of shares, clicks, and conversions over time, allowing developers to easily test the feature."
The beta release of KiiReferral includes the framework that extends the functionality of Kii's backend platform. Developers can track statistics in real-time; allow users to share the app with configurable messages to their social networks; encourage referrers' friends to download the app and reward the referrer for conversions; trigger events when conversions occur (i.e., give bonus points, extra features); and track conversions on a user-level via the SDK.
The release is hosted on Kii's Github page, which includes full guides, documentation, and instructions for adding the framework to the app. It also comes with server extensions to augment the core functionality as well as a full sample app to get up and running.


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Our HID kits come with all the necessary components to complete your installation. This state of the art technology provides up to 10x longer bulb life and 3x brighter light than standard issue halogen bulbs. The improved lighting will make you a more confident driver behind the wheel by giving your more coverage of the road at night, exposing things that could be potentially hazardous. Making the upgrade to one of our high quality HID kits is not only a safety measure, it gives the owner some styling options as well by letting you choose the exact color of HID bulb you're looking for. We carry colors ranging from bright white to cool blue to violet purple.
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text:
This DVD, featuring four rare comedy television shows from the 1950s, includes:
The Beulah Show (1951): Academy Award and Emmy nominee Ethel Waters stars as the down-to-earth housekeeper with a twinkle in her eye. This episode features guest appearances by Dooley Wilson as Beulah's boyfriend Bill and Butterfly McQueen as her chum Oriole.
The Ruggles (1952): Popular entertainer and screen favorite Charlie Ruggles plays a fictionalized version of himself in this classic sitcom, as an entertainer trying to balance career and family.
Behind the Scenes (1959): Aspiring actress Sally Smith decides she's going to turn her attention to screenwriting, but when her script is accidentally switched with the one being written by the screenwriter next door, she and her roommate Jill Butler suddenly find themselves taking meetings with Hollywood agents and studio heads�and making demands that will turn Tinseltown upside-down! Starring Sally Fraser, Jil Jarmyn and Jesse White.
Peck's Bad Girl (1959): Patty McCormack plays Torey Peck, an all-American teenager who is sometimes at odds with her bewildered parents and her bratty little brother. This sitcom, which ran only 14 episodes, was one of the first which broke down the "fourth wall," as Torey speaks directly to the audience. (The series' music was provided by Jerry Goldsmith, among the most esteemed composers in Hollywood history.)


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Lobbyist Profile: Summary, 2019
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Feel free to distribute or cite this material, but please credit the Center for Responsive Politics. For permission to reprint for commercial uses, such as textbooks, contact the Center: email@example.com


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Shock2k wrote:Hogster, wait a minute did we play already? I must have missed that. There is nothing to prove. Not because of history, because there is no precedence for this Seahawks team right now, so no way to compare them to anything.
The game will settle this debate for sure. And, no I'm not relying on the past. That's the Cowboys fan base. What I'm saying is that you can't ignore the fact that your team--in this season--with these players, has looked like a totally different team than the one that has gone 8-0 at home.
That's relavant because this game is on the East Coast. It's not just the fans, it's the travel, time difference, climate etc. Just like if this game were in Seattle, your prior 8 wins wouldn't matter, but it would be relevant to what impact your crowd or sound guy or stadium has on games/


text:
Hope College Jazz Chamber Ensembles will perform on Monday, Nov. 12, at 7:30 p.m. in Wichers Auditorium of Nykerk Hall of Music.
The featured groups will be the Prestige Ensemble, the Vanguard Ensemble, the Verve Ensemble and the Blue Note Ensemble.
The public is invited. Admission is free.
In addition, there will also be a post-concert event at 9 p.m. at Butch's in downtown Holland featuring the Bossa Nova Ensemble and Contemporary Ensemble. Audience members must be at least 21 to attend the event at Butch's.
The Prestige Ensemble will perform "Sonnymoon for Two," by Sonny Rollins; "Little Sunflower," by Freddie Hubbard; and "Autumn Leaves," by Joseph Kosma. The group is coached by senior Michael Reynolds of Tampa, Fla., and the advisor is Brian Coyle, who is a professor of music and director of the jazz studies area at Hope. The students involved in this ensemble are: guest student Isaac Anderson of Holland, piano; Michael Reynolds, drums; sophomore Macall Smith of Macatawa, guitar; and freshman Daniel Stevens of Kalamazoo.
The Vanguard Ensemble will perform "On Green Dolphin Street," by Bronislav Kaper; "Recordame," by Joe Henderson; and "In Walked Bud," by Thelonious Monk. The group is coached by Mike VanLente, instructor of jazz percussion, and the student participants are: freshman Ryan Backman of Oro Valley, Ariz., bass; junior Guillermo Flores of Holland, alto saxophone; sophomore Ashley Ritsema of Grand Rapids, alto saxophone; freshman Matt Tallman of York, Pa., piano; and freshman Tingxuan Zhang of Suzhou, China, drums.
The Verve Ensemble will perform "A Night in Tunisia," by John Gillespie; "Topsy," by Battle/ Durham; "We'll Be Together Again," by Fischer/Laine; and "Passion Dance," by McCoy Tyner. The group is coached by Tom Lockwood, instructor of saxophone, and the student participants are: junior Blake Daugherty of Muskegon, drums; freshman Carsten Forester of Holland, bass; senior Justin Makowski of Detroit, piano; and junior Christian Nikkel of Holland, guitar.
The Blue Note Ensemble will perform "I'll Remember April," by de Paul and Raye; "Well You Needn't," by Thelonious Monk; and "Spain," by Chick Corea. The group is coached by Steve Talaga, instructor of jazz piano and competition, and the students involved are: junior Forrest Dodson of Kalamazoo, bass; freshman Palmer D'Orazio of Clarkston, alto saxophone; sophomore Jarred Mackey of Jackson, drums; and freshman Colin Rensch of Kalamazoo, piano.
The Bossa Nova Ensemble's performance at Butch's has been scheduled in anticipation of the 50th anniversary of the landmark Stan Getz/Joao Gilberto album that brought the Bossa Nova style of music to the United States. The college's Bossa Nova Ensemble includes: junior Matt Costello of Holland, bass; junior Michael Graverson of Hamilton, guitar; senior Wesley Rieth of Three Oaks, drums; and junior Meghan Stagl of Deerfield, Ill., piano/vocals. The Contemporary Ensemble includes: junior Jared DeMeester of Grand Rapids, bass; senior Luke Panning of Holland, violin; senior Michael Reynolds of Tampa, Fla., piano; and senior Wayne Titus of Canton, drums.
The Jazz Chamber Ensembles afford students the opportunity to perform in the classic small-group combo setting. The ensembles vary in size and instrumentation, and place a creative focus on improvisation and group communication. All of the ensembles perform works from the classic jazz repertoire. The more advanced jazz chamber ensembles also perform repertoire from the contemporary jazz world. These ensembles also place an emphasis on original student and faculty compositions. All ensembles are coached by members of the Hope College jazz faculty. The Jazz Chamber Ensembles are open to anyone interested, regardless of experience with jazz.
Nykerk Hall of Music is located in the central Hope campus at the former 127 E. 12th Street between College and Columbia avenues. Butch's is located at 44 E. Eighth St.


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YAMHILL, Ore. — Don't stand in the way of middle school students at lunch time, especially with the aroma of barbecued beef sandwiches filling the cafeteria.
Students at Yamhill-Carlton Intermediate School, many of them wearing western hats and boots for the occasion, were treated to a day-long lesson Wednesday on where their meat comes from, courtesy of the Oregon Cattlemen's Association and the Oregon Farm to School program.
The sandwiches were a big draw, along with white and brown desserts called haystacks and cowpies, but Maupin, Ore., cattle rancher Keith Nantz and his dog, Pancho, may have been the star attractions. Nantz talked about raising cattle and fending off predators, and showed how his 5-year-old border collie responds to commands.
"The main thing is to teach them where food comes from and to close the gap between the urban and rural mindset," Nantz said. There's a "huge disconnect," he said, and farmers and ranchers need to spend more time explaining agriculture in the context of Oregon's economy, culture and food safety.
The event was an educational adjunct to the Farm to School program, which links growers and processors with school lunch programs. As schools have been called upon to provide more healthful meals, many are turning to local producers for fruit, vegetables, meat and grains. State funding encourages the switch.
Jane Gullett, the Yamhill-Carlton School District's food service director, said students now get five entree choices daily and a self-serve fruit and vegetable bar. Lunchrooms offer whole grain bread products — even the nacho chips. About 60 percent of the district's students eat school lunches.
"It's going well," Gullett said. "Students are pleased with what they get for lunch."
So are local farmers and food processors. Yamhill-Carlton buys meat from Carlton Farms, a nearby processing plant that also sells to distributors and grocery chains. The barbecued top sirloin sandwiches served during Wednesday's event came from Carlton Farms.
The processing plant sells 25 million pounds of meat annually, so the several hundred pounds of pot roast and ground beef the school district has bought this year doesn't have much financial impact, but company President John Duyn is happy to take part.
In the past, before the federal government raised the nutrition standards for school lunches, the district bought pre-cooked, crumbled hamburger from another source, Duyn said. The meat was difficult to make palatable, he said, and students didn't like it. Meat his company sells to the district comes from cattle raised in the Pacific Northwest and is processed less than 5 miles away, he said.
Duyn estimates half his 70 employees are Yamhill-Carlton graduates and many have children attending the district's schools, and feel a connection to the district.
"It's extremely important that they have quality protein that's good and good for them," Duyn said.
In nearby McMinnville, Betty Lou's Inc. makes two kinds of fruit bars for the district and hopes to sell to more school districts in the future. The bars represent what school nutritionists are looking for: They contain no refined sugar and no hydrogenated oils, or trans fats. No wheat or GMOs, either, says John Sizemore, who supervises the company's manufacturing plant.
"They're healthy and the kids love them, and that's a tough combination to beat," Sizemore said.
The grant money comes from House Bill 2649, the Farm to School and School Garden Bill passed by the Oregon Legislature in 2013. Moving quickly, the state Department of Education in August awarded $1.17 million in grants to Yamhill-Carlton and 18 other school districts. Under the legislation, 82 percent of the money is to be spent buying Oregon food products and 18 percent can be spent on educational agricultural, food or garden activities.
The other districts receiving grants were Beaverton, Bend-LaPine, Bethel, Centennial, Clatskanie, Corvallis, Hillsboro, Joseph, Lebanon, Molalla, North Powder, Oakridge, Port Orford, Portland, Rainier, Salem-Keizer, Sisters and Springfield, according to the education department.
Including ranchers from the Oregon Cattlemen's Association in Wednesday's assembly was part of the educational component emphasized in the Farm to School grant.
"We want students to have a great time and to learn about Oregon beef: Where it comes from, how it's processed, and how it's delivered to their tables," said Gullett, Yamhill-Carlton's food service manager.
In addition, school workers put up maps showing where Oregon products are grown, and the Cattlemen's Association brought along some lassos and cow horn targets for the students to try their hands at roping.
Directly involving producers and groups such as the Cattlemen's Association is a welcome expansion of the original idea of improving school nutrition, said Michelle Markesteyn Ratcliffe, program manager with the Oregon Department of Agriculture.
"Farm to School 10 years ago was about fresh fruit and vegetables," she said. "Now it's about the whole plate."


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Retain/recall semantics enable selected data on the call stack to be accessible from descendant frames.They are similar to dynamic scoping and the structural opposite of throw/catch. For many problems that developers currently use global data to address, retain/recall can be more convenient and flexible. The approach is safe for concurrent, recursive, and re-entrant code. In this article, I explain retain/recall and give an efficient implementation of the idea in C++ using the Posix and Win32 threading libraries.
Introducing Retain/Recall
In a typical modern programming language, information comes from:
- local (automatic) data
- passed (argument) data
- instance data if the code is part of an instance of an object.
- class (static) data if the code is part of a class, but not an instance.
- global data.
While global and class (static) data can be used from anywhere, they represent a shared resource that can break recursion, re-entrancy, and multithreading. Other items, though, have more limited accessibility, and a software engineer occasionally discovers that a program requires data to which there is no easy access.
For example, there may be a decoding library that was designed for internal algorithms, but now needs to have access to a system key store, which needs some kind of authorization context in order to open. At this point, the developer typically has two options (both with significant drawbacks):
- Rewrite the software or infrastructure so that the necessary data does get to that point (as instance or argument data). This may be impossible or create an unwieldy solution.
- Add global or class (static) data that is more universally accessible.
Error conditions used to suffer an analogous fate. Before throw/catch, a new error state could be handled in two ways:
- Return a new kind of error status to the caller, and upgrade the infrastructure so this potential error status traversed back to where it could be managed.
- Add global or class (static) data that recorded the error state. Hope that all the intervening code did not really break something before the error state was noticed and managed.
The throw/catch construct addresses this by allowing error conditions to safely work back through the call stack to a handler, even when the condition was not foreseen by the programmer who wrote the intervening text. In a sense, the throw/catch extends the visibility model so that exceptions (data about exceptional situations) can reach arbitrarily back in the call stack to address them.
This allows a third resolution to error handling; namely, throw an exception where it occurs and catch it (lower in the call stack) where you can handle it. This approach addresses the error handling problem without modifying infrastructure between the throw and catch frames or introducing global state. If there are more than one acceptable catch clauses for a given error, the latest one on the stack applies. Thus, nesting and recursion work fine and is there no global state to hinder re-entrance or multithreading.
If passing data from the current frame back in ancestral frames is such a good thing, what about accessing data from ancestral frames from code in the current frame? We call this kind of data visibility retained visibility because data values are retained (remembered) in a frame, which can then be recalled from any later frame. Figure 1 shows how throw/catch and retain/recall are related.
Figure 1: Comparing throw/catch (left) with retain/recall (right). The stack grows upward in the illustration.
In Figure 1, a throw unwinds the stack to the first matching catch, but the text for a recalled value executes in the current frame. Note that a thrown value is caught once, but a retained value can be recalled zero or more times. Note that, for throw/catch,
text1 may rethrow a in order to activate
text2(). Similarly, for retain/recall, a deepening recall would give access to
a2, which is hidden from a simple recall by
a1. Having retained visibility allows for a new solution to the data access problem: Retain a value where you know it; recall it (higher in the call stack) when you need it.
Retain/Recall Semantics
The semantics for retain/recall in a language that supports retained visibility are as follows:
- Retain a value for a type. This must be a statement within executable text. From the point of retention to the forget (explicit) or the end of the enclosing block/frame (implicit), we say that value is retained as that type, and structurally is a new block. It should be possible to retain any value derivable from the given type.
- Forget a value for a type. This must happen after a retain for the same type and value in the same block. It may be implicit at the end of the block containing a retain (but in the reverse order in the case of multiple retains).
- Retain a value for a type if a condition is true. Retain as above if the condition is true. A language may use a short-circuited evaluation of value in cases where the condition is false ( so the value is unused).
- Recall a value for a type. This must be an expression within executable text. A language may match this to a retain narrowly or broadly. A recall looks successively through each ancestral block/frame; the first block/frame that retained a value as the same type (narrow) or a derived type (broad) resolves the recalled value. Note that a given retain can resolve many recalls. If there is no matching retain, the recall fails.
- Deepening recall of a given type. There must be a mechanism for obtaining the sequence of retained values matching a given recall in frame deepening order.
- Failure. It must be possible to determine if a recall or the next step in a deepening recall will fail.
A broad matching of a recall to an ancestral retain would keep retain/recall in structural symmetry with throw/catch, since a catch will typically match a throw of a derived type value. However, this may not be in the best interest of the programmer. Allowing catch-alls is a convenience when trying to account for any number of error conditions, as might be the case nearer the root of the call tree. But recalls tend toward the branches of the call tree, where a recall of something specific is likely to be more useful. It also reduces the possibility of a hidden retention, where the desired value is retained, but a retention of a different (but derivable) type effectively hides it from recall (but not a deepening recall).
Implementing Retained Visibility in C++
Figure 2 illustrates how the retain of a given type can be implemented for a given thread. The structure has to be repeated for each thread and each type for which there are retained values.
Figure 2: Retained structure.
Each frame that has a retain for the given type is part of a linked list on the stack.
s_current is a thread-local value that refers to the top most element in this list. Each retain keeps the address of the value it is retaining as. To recall a value, we only need to look at the
m_as field of the
s_current record.
Retain-if records where the condition is false are skipped in the linked list.
For the sake of simplicity, consider the following retain class and recall function to support retained values of type
T in a single-threaded environment. For the nonce, I have ignored template, access, and initialization notational details.
class retain { static retain* s_current=0; // initial null/0 value retain* m_previous; // previous retained T* m_as; // what this retains as retain(T* as) { m_previous=s_current; s_current=this; m_as=as; } ~retain() { s_current=m_previous; } }; bool retained() { return retain::s_current != 0; } T* recall() { return retain::s_current->m_as; }
Now consider the following test of retain/recall (used as a template):
#include <assert.h> #include "retain.hpp" void inc() { int *p=recall<int>(); ++(*p); } int main() { int x=0,y=0; { auto retain<int> as(&x); inc(); assert(x == 1); { auto retain<int> as(&y); inc(); assert(y == 1); } inc(); assert(x == 2); } return 0; }
There is a static value,
retain, for the address of the current retain record, and the construction of a new retain instance creates two pointer values: one that stores the previous retain record, and one pointer to what the record is retaining,
as. Recalling is simply returning the
as pointer from the retained static value. In the multithreaded case, the ideas are all the same, except that the static
s_current value is kept in thread-local storage instead. The header file
retain.hpp defines a thread-safe version of this idea as a template using Posix or Win32 thread-local storage. See the section on using the reference C++ Posix/Win32 implementation toward the end of this article for an explanation of the various APIs that are based on this approach.


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The City of Lakewood will be holding aSpecial Election on July 2, 2019
Please visit our City Council Meeting Information page to view upcoming City Council Meeting and Study Session agendas and information. The schedule reflects the latest available information. Agenda items listed are tentative only and subject to change, including removal or addition of agenda items. They are included here in the City's efforts for improved communications and transparency. The City of Lakewood does not discriminate on the basis of race, age, national origin, color, creed, religion, sex, sexual orientation or disability in the provision of services. People with disabilities needing reasonable accommodation to attend or participate in a City service program, can call 303-987-7080 or TDD 303-987-7057. Please give notice as far in advance as possible so we can accommodate your request.


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