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Changing Culture: Gas Sales vs Demographics
Written by Syndicated Publisher No Comments
The Department of Energy's Energy Information Administration (EIA) data on volume sales is over two months old when it released. The latest numbers through mid-September were released are now available. However, this report offers an interesting perspective on fascinating aspects of the US economy. Gasoline prices and increases in fuel efficiency are important factors, but there are also some significant demographic and cultural dynamics in this data series.
Because the sales data are highly volatile with some obvious seasonality, I've added a 12-month moving average (MA) to give a clearer indication of the long-term trends.
Click for a larger image
The next chart includes an overlay of monthly retail gasoline prices, all grades and formulations. I've shortened the timeline to start with EIA price series, which dates from April 1993. The retail prices areupdated weekly, so the price series is the more current of the two.
As we would expect, the rapid rise in gasoline prices in 2008 was accompanied by a significant drop in sales volume. With the official end of the recession in June 2009, sales reversed direction … slightly. The 12-month MA hit an interim high in November 2010, and then resumed contraction. The moving average for the latest month (September 2012) is about 7.3% below the pre-recession level and 4.2% off the November 2010 interim high. In fact, the latest data point is a level first achieved over fourteen years ago, in September 1998.
Some of the shrinkage in sales can be attributed to more fuel-efficient cars. But that presumably would be minor over shorter time frames and would be offset to some extent by population growth. Also, if we look at Edmunds.com for data on the top 10 best-selling vehicles, energy efficiency doesn't seem to be a key factor, to judge from the weighting towards pickup trucks and of SUVs.
While on the topic of fuel-efficiency on gasoline sales, I was rather surprised by a Polk survey report that made the rounds back in April.
While the selection of hybrid models in the U.S. has more than doubled since 2007, only 35 percent of hybrid vehicle owners choose to purchase a hybrid again when returning to market in 2011, according to recent analysis by Polk (See Table A). If repurchase behavior among the high volume audience of Toyota Prius owners isn't factored in, hybrid loyalty drops to under 25 percent. [Full Report]
Average Daily Volume Sales Per Capita
The next chart adjusts the 12-month MA of sales volume for population growth based on the monthly data for Civilian Non-Institutional Population over age 16 from the Bureau of Labor Statistics, via the St. Louis FRED repository. What we see here is that gasoline sales on a per-capita basis are 6.7% lower than it was at the end of the Great Recession. The gallons-per-capita series includes the complete EIA data, but since I'm using the 12-month MA, the red line starts in 1984. We see the double peak in March 1989 (the all-time high) and August 1990. The latest per-capita daily average is 19.5% below the 1989 high.
What does this analysis suggest about the state of the economy? From an official standpoint, the Great Recession ended 39 months before the most recent gasoline sales monthly data point. But if we want a simple confirmation that the economy is in recovery, gasoline sales continues to be the wrong place to look.
In addition to improvements in fuel efficiency, the decline in gasoline consumption is attributable in large part to some powerful secular changes in US demographics and cultural in general:
We have an aging population leaving the workforce, which we clearly see in the sustained contraction in the employment-population ratio.
There is growing trend toward a portable workplace and the ability to work from home (I'm a typical example).
Social media have provided powerful alternatives to face-to-face interaction requiring transportation (Internet apps, games, the ubiquitous cell phone for talk and texting).
There has been general trend in young adults to drive less (related to points two and three above). See this PDF report for details.
We are indeed living in interesting times.
Images: Flickr (licence attribution)
My original dshort.com website was launched in February 2005 using a domain name based on my real name, Doug Short. I'm a formerly retired first wave boomer with a Ph.D. in English from Duke. Now my website has been acquired byAdvisor Perspectives, where I have been appointed the Vice President of Research.
My first career was a faculty position at North Carolina State University, where I achieved the rank of Full Professor in 1983. During the early '80s I got hooked on academic uses of microcomputers for research and instruction. In 1983, I co-directed the Sixth International Conference on Computers and the Humanities. An IBM executive who attended the conference made me a job offer I couldn't refuse.
Thus began my new career as a Higher Education Consultant for IBM — an ambassador for Information Technology to major universities around the country. After 12 years with Big Blue, I grew tired of the constant travel and left for a series of IT management positions in the Research Triangle area of North Carolina. I concluded my IT career managing the group responsible for email and research databases at GlaxoSmithKline until my retirement in 2006.
Contrary to what many visitors assume based on my last name, I'm not a bearish short seller. It's true that some of my content has been a bit pessimistic in recent years. But I believe this is a result of economic realities and not a personal bias. For the record, my efforts to educate others about bear markets date from November 2007, as this Motley Fool article attests.
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A naughty puzzle game, match up item around the room to make things happen, if you re lucky the babysitter will give you a hot kiss.
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Template Feat New Fresh Cute Labels Contemporary Themes Ideas Wallpaper To Frame 5202 Avery For Word published on template. which is part of the template collection. It's full resolution is 700x904 Pixels.


Since one of the backbones of Arnold's budget plan is IOUs, ya gotta wonder if they will become legal tender. This guy does not find merchants enthused with the idea. More seriously, debt had been a leading indicator of our state budget problems for years. Arnold came to the Governor's office promissing lots of bold reform, blowing up the boxes, yada yada. So far the only bold change he has made is making debt a cornerstone of out budget. Used to be debt was modest and was to pay for infrastructure. Now, every election we pass bonds to pay for all manner of ongoing state programs and general budget expenditures. California's debt has nearly tripled in just the past six years, from $42.1 billion in fiscal year 2001-02 to $120.1 billion in FY 2007-08. The debt-service ratio–the portion of the state's annual revenues that must be set aside to make payments on the state debt, is on track to reach 10 percent before long. (See Reason's analysis of CA's debt here). Now paying off the debt gobbles up a large and increasing share of the budget each year, and, faced with falling revenue, Arnold's first response is to go back to the credit card. All this just means that next year there is less money to use after debt payments are made, and another budget crisis. We Californians will never forget this decade, because we will be paying for it until we die.


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Celine Dion sick: what illness does she suffer from?
Once upon a time in the West: why is this film at the origin of a falling out between Clint Eastwood and Sergio Leone?
The day when Édouard Philippe "cried with rage" at Matignon
The entrepreneurial family reorganizes its empire
Impressive explosion of a volcano in Tonga, tsunami warning
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2021 was the 5th hottest year on record in the world, according to an EU study
by Kate Abnett
BRUSSELS (Reuters) – Last year was the fifth hottest on record in the world, as levels of carbon dioxide and methane in the atmosphere, causing global warming, reached new highs in 2021, according to the European Scientific Department Copernicus on Climate Change (C3S).
Globally, 2021 was the fifth warmest year on record, with an average temperature 1.1 to 1.2 ° C above 1850-1900 levels. The past seven years have been the warmest on record in the world, "by a clear margin," C3S said in a report released on Monday.
The long-term global warming trend has continued and record-breaking weather conditions swept the world last year, ranging from flooding in Europe, China and South Sudan, to wildfires in Siberia and the states. -United.
"These events are a stark reminder of the need to change our habits, to take decisive and effective measures in favor of a sustainable society and to work for the reduction of net carbon emissions", declared Carlo Buontempo, director of C3S .
The hottest years on record were 2020 and 2016.
Global levels of CO2 and methane in the atmosphere – the main greenhouse gases – have continued to rise, peaking in 2021.
HOTTEST SUMMER EVER RECORDED IN EUROPE
CO2 levels thus reached 414.3 parts per million (ppm) in 2021, an increase of about 2.4 ppm compared to 2020, according to C3S.
As for methane, C3S said levels have jumped over the past two years, but the reasons remain unclear. Methane emissions come from oil and gas production, agriculture and natural sources.
As a result, Europe experienced its hottest summer on record in 2021, after a hot March and exceptionally cold April decimated fruit crops in countries like France and Hungary.
In July and August, a Mediterranean heat wave caused intense forest fires in countries like Turkey and Greece. Sicily has even set a new European temperature record – which is awaiting official confirmation – of 48.8 ° C.
Also in California, a record-breaking heat wave was followed by the second-largest wildfire in state history.
In July, more than 200 people died in deadly floods in Western Europe, as well as in China in Henan province where 300 people died.
Scientists concluded that these events have been exacerbated by climate change and that other extreme events are likely to become more frequent or more severe in the future.
(Report Kate Abnet; French version Dina Kartit, edited by Jean-Michel Bélot)
Tagged 5thhottestrecordStudyworldyear
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Business owner donates…
Business owner donates T-shirts honoring Uvalde shooting victims
SAN ANTONIO – In the aftermath of the tragedy, surviving community members have often expressed feelings of helplessness or a desire to make a difference in a small way. For San Antonio business owner Johana Garcia, paying her respects to the growing memorial site outside Robb Elementary School in Uvalde after Tuesday's mass shooting felt necessary.
"I have a 10-year-old at home," Garcia said. "Even thinking about what they went through, the fear, you know, the whole time, the survivors, lying there … not for anyone to go through, (even) a child."
Garcia, who makes and sells T-shirts outside his home, said he traveled to Uvalde with his mother. But before they left, Garcia decided to make custom T-shirts with the victims 'faces that he and his mother would wear to the memorial as a way to honor their lives.
Garcia's mother decided to push her son to make his move one step further.
"He said,' What if I bought your shirts and you donated them? '" Garcia told KENS 5 reporter Henry Ramos. "I posted it on my Facebook and friends and family started donating, so we got over 150 shirts we brought to give away."
Garcia dropped his last 20 T-shirts when he spoke to Ramos, but he also hopes he can send some shirts to the victims 'families.
"I just wanted to do and make shirts … that's how I found the way to help."
MOVING: Memorial outside this Uvalde Day Care Center. Seats for all children and two teachers. It has their names. People also leave messages. #kens5 pic.twitter.com/XiswMMWOuI
– Henry RamosTV (@HenryRamosTV) May 29, 2022


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Boris Zbarsky bzbarsky at MIT.EDU
Michael Davidson wrote:
> - As for persistence beyond browser lifetime, I understand the
> reticence. However, similar problems have been solved in the past.
> Flash asks the user for access to hardware like cameras. Surely being
> able to take pictures of users is as scary as running code after the
> browser has closed.
I don't think it is, no.  Taking a picture is a one-time activity; the
user knows exactly what he's getting into.  And once the picture is
taken, no more picture-taking until the user says so explicitly.
I, personally, would be hard-pressed to describe the
persistence-beyond-browser-lifetime issue to a typical user in a way
that would allow him to make an informed decision on it.
Heck, I would be hard-pressed to explain it via a browser dialog or the
like even to a very intelligent user who happens to not be intimately
familiar with the way their computer and the internet happen to work. I
could do it in 10-15 minutes of in-person conversation, probably.  Or
several typed sheets of paper worth of text...
> For browsers that do have extensions, having the
> extension outlive the visible browser process doesn't seem like that
> great a leap in functionality.
While this is true, extensions (at least in Firefox) are installed with
the following user-facing caveats:
1)  You have to explicitly opt-in to the install source, unless it's
addons.mozilla.org.
2)  You are told that extensions can do anything they want to.
Item 1 above is very important.
Note that you could write a Firefox extension that outlives the browser
today.  Just include a binary component that starts a separate process.
> Perhaps the install UI could look and feel more
> like the UI for installing a native app?
Really, it sounds like you want something more akin to a Prism app [1]
than anything else.  You don't _actually_ want to run gmail in a browser
window.  You just want to deliver it over http:// and leverage a
browser-like thing on the other end for rendering it, right?
-Boris
[1] http://prism.mozilla.com/


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text:
Ardenn is an kor scout from Zendikar. As an archaeologist, he focuses on finding ancient kor artifacts
When the Skyclaves of Zendikar rose once again, many of them had previously been destroyed. While the entirety of the ruins took to the skies, broken-off chunks did not necessarily reattach. This resulted in free-floating structures, out of reach of the average adventurer. While Zendikar is rife with talented line-slingers, few were interested in risking their lives to access these obscure ruins—not when the "accessible" Skyclaves were filled with treasures of their own.
But dangerous, unexplored ruins were exactly what Ardenn was looking for. As an archaeologist focused on ancient kor artifacts, the Skyclaves were his dreams come true. He had no interest in pursuing the beaten path and put his line-slinging skills to the test to explore the free-floating fragments. So far, his expeditions have been successful. Ardenn has discovered forgotten secrets from Zendikar's history and mysterious artifacts he has only just begun to understand.[1]
Ardenn, Intrepid Archaeologist
↑ Ari Zirulnik and Ethan Fleischer (November 06, 2020). "The Legendary Characters of Commander Legends, Part 2". magicthegathering.com. Wizards of the Coast.
Retrieved from "https://mtg.fandom.com/wiki/Ardenn?oldid=387808"


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Home News Local News
Police: Odessa Officer Fatally Shoots Gunman At Business – Beaumont Enterprise
Feb. 19, 2022 Updated: Feb. 19, 2022 11:14 a.m.
ODESSA, Texas (AP) — Police in Odessa say an officer fatally shot a man who had opened fire and shot at the officer at a local business.
John Michael Humphries, 45, was killed in the shooting, according to a police statement on Friday. The officer's name was not released.
The officers were responding to reports of a gunman at the business shortly after 3:30 p.m. Thursday when they encountered Humphries, according to the statement.
Humphries then left and drove around the business before going back inside and firing a shot, then shot at an officer approaching the business who returned fire, killing Humphries.
The officer is now on paid leave pending an investigation into the shooting by Texas Rangers.


Pam Slim is the author of the upcoming Escape From Cubicle Nation. She has been writing a blog by the same name for some time. The book coming out April 30th. This is just a taste. I will be having Pam back for a longer interview when the book publishes.
I just posted this question on Twitter and LinkedIn and got a lot of interesting responses. From paper snowflakes, to muffins, to cookies, to photos, to records; these are the things that first came to people's minds when considering the question. These things are what they like to make.


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The Circle of Life A Review of Dead Children at The Side Project
October 13, 2016 at 3:00 pm by Alex Huntsberger
by Alex Huntsberger
October 13, 2016 November 5, 2016 Filed under:
Kirsten D'Aurelio, Elizabeth Bagby and Barbara Roeder Harris/Photo: Scott Dray
A good motto for Robert Tenges' new play, "Dead Children" would be that old chestnut from Disney's "The Lion King": It's the circle of life. Only, here, that circle would seem more like a noose. Tenges' characters mostly live dead-end lives in dead-end towns, just like their parents did and just like their children will too. The circle of their lives is something that these people want desperately to escape.
The play begins with a separation as husband Tom (Erik Wagner) and wife Renata (Kirsten D'Aurelio) decide to part ways. It's not an angry separation but the break is definite. Tom moves out and stays with his sister Petra (Shawna Tucker), a woman whose life seemingly revolves around church—the same church in which she and Tom were raised. Tom reconnects with his old girlfriend, Mary Jo (Victoria Walters Gilbert), who's had a child, bottomed-out and gotten sober (with some relapses) in the years between.
Renata, meanwhile, is in a far stickier situation: Her father is in a coma and her mother, Gwen (Barbara Roeder Harris), is starting to suffer from dementia. It's hard to tell whether or not the illness is making Gwen meaner, as she was pretty nasty to begin with—at one point Renata takes her sister Kelly (Elizabeth Bagby) through a walking tour of the literal scars their mother inflicted on Renata's young body.
"Dead Children,"which is being produced by the side project, is the fifth collaboration between Tenges and side project artistic director Adam Webster. The play itself, however, is being performed at Chicago Dramatists through the company's Grafting program. It's clearly a fruitful partnership, with Webster's controlled, minimalist direction perfectly drawing out Tenges' slow-burning realism.
At times, it can feel like the staging is almost a bit too minimalist—scenes that might work in the side project's uber-cramped environs get lost in the slightly larger Chicago Dramatists space—but that complaint is a small one. The play is an assured, well-acted and heart-rending success. "Dead Children" might certainly be a slow, slow burn—but there are plenty of fireworks on the other end. (Alex Huntsberger)
The Side Project at Chicago Dramatists, 1105 West Chicago, thesideproject.com, $20-$25. Through October 23.
Well-Furnished Yet Vacant: A Review of Circle House at The Plagiarists "Circle House" has three different paths, led by one of three different spirits—my guide was Devereaux (Emily Green)—and each accompanied by a different manifestation of time (Tick, Tack or Tock). They pour Tic-Tacs into your palm before the show. There are disclaimers of hallucinations and aberrations within the fabric of this universe so that we know that this isn't like…
Power Play: A Review of Venus in Fur at Circle Theatre Chicago RECOMMENDED David Ives' "Venus In Fur" is a potent piece of metatheatrics: a director holding the final audition for his adaptation of the nineteenth-century novel "Venus in Fur" reeks of a show made by and for theater folks. And it is: between the in-jokes and wild shifts of character and power dynamics, the ever-deepening layers of deception require powerful compasses…
Solid Gold and the Service Life Every dancer knows the galling, near-eternal struggle with poverty that comes with the decision to pursue the art form, a poverty that defines a life of hardscrabble racing from rehearsal to rehearsal, often capped off with equally long, arduous nights on one's feet serving tables. It's punishing, thankless work that just as often as not leads nowhere. It's a reality…
Life and Liberty: A Review of Be Here Now at Shattered Globe Theatre A poignant and pertinent exploration of the pursuit of happiness.
The Median and The Mean: A Review of Life On Paper at Jackalope Theatre "Ideation" meets "It's a Wonderful Life" in this world premiere from Kenneth Lin.
Life and Limb: A Review of Hang Man at The Gift Theatre This Gift Theatre world premiere asks uncomfortable questions about the visibility and value of black lives.
Adam Webster
Barbara Roeder Harris
Elizabeth Bagby
Erik Wagner
Kirsten D'Aurelio
Robert Tenges
Shawna Tucker
Victoria Walters Gilbert
Previous Post Shakespeare Unplugged
Next Post Movement and the Mason's Line
Nothing to Shout About: A Review of Whisper House at Black Button Eyes Productions
The Art of Loss: A Review of Thirst at Strawdog Theatre Company
Gone Fishin': A Review of The Gulf at About Face Theatre
Wherefore Art Thou: A Review of Juliet at Theatre Y
Lonely at the Top: A Review of Top Girls at Remy Bumppo Theatre Company
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As Joseph Holway neared the Missouri River our desire to meet him out on the road grew stronger. It had been just over a week since we parted ways west of Manhattan and Joseph had ridden more than most of us do in a year. We traveled to St. Joseph, MO, the birthplace of the Pony Express, in hopes of intercepting Joseph before he crossed the Missouri River and officially into the west.
When we found Joseph, he had adapted to the heat and humidity of the midwest and taken to riding late into the evening and sleeping during the day. He was still having fun despite the loneliness on the road. Denver is the next big milestone after crossing Kansas and he is likely arriving there today. The promise of friends and riding partners keeps him going after all these miles.
See you at Golden Saddle on July 1st for Joseph's arrival.


text:
\section{Introduction}
When a global structure (or organism) forms because of the connections formed by strictly simpler structures to one another, following only local rules, we say the global structure self-assembles.  The goal of the emerging field of \emph{algorithmic self-assembly} is to direct (or to program) the self-assembly of desired structures, by constructing self-assembling agents, and their environment, so they combine to form a desired result.  Two main research areas have studied algorithmic self-assembly: nanotechnology and robotics.  Nanostructure self-assembly dates back to the 1980's, when Seeman engineered ``tiles'' from DNA strands that could connect to other tiles~\cite{denovo}.  Winfree~\cite{winfree} (and later Rothemund as well~\cite{rothemund}) designed a Tile Assembly Model as a mathematical abstraction of nanotile self-assembly.  This Tile Assembly Model has become a fundamental tool in both theoretical and practical research.  Our focus, though, in this paper, is on a theoretical advance that came out of the field of robotics: \emph{graph assembly systems}, introduced by Klavins \emph{et al.} in 2004~\cite{klavinsghrist}.  Graph assembly systems are a special class of graph grammars, and they provide a symbolic and topological characterization of a wide variety of systems of self-assembly.  For example, a graph assembly system that simulates the Tile Assembly Model appears in~\cite{Klavins04directedself-assembly}.  It turns out that graph assembly systems can be embedded in a graph rewriting characterization of distributed systems that was proposed by Degano and Montanari over twenty years ago~\cite{deganomontanari}.  We explore that observation in this paper, to make rigorous the intuition that self-assembling systems are distributed systems.

The formalisms to model self-assembling systems contain the following: a finite set of distinct types of self-assembling agents, a set of local binding rules that completely determines the behavior of the agents, and an initial configuration of the system. A particular self-assembly ``run'' starts with an operator placing a finite seed assembly on the surface, and then allowing a ``solution'' containing infintely many of each agent type to mix on the surface.  Agents bind to the seed assembly, and to the growing configuration, consistent with the local rules, and in a random, asynchronous manner.  In the Winfree-Rothemund Tile Assembly Model, each agent is a four-sided tile, and the assembly surface is the two-dimensional integer plane.  When designing a \emph{tile assembly system} (a set of tile types and an initial seed tile) within this model, it would be useful to know whether all error-free self-assembly runs terminate in the same terminal assembly. Soloveichik and Winfree proved a useful criterion for this, called \emph{local determinism}~\cite{solwin}: every locally deterministic tile assembly system has a unique terminal assembly.  In this paper, we use theorems of Degano and Montanari about their graph grammar characterization of distributed systems to generalize local determinism to graph assembly systems---providing, for the first time, a criterion for proving uniqueness of terminal assembly for systems that assemble in a space other than the plane, or that contain agents that are not 4-sided.

Next, we prove a partial converse of the embedding results, by showing that all distributed systems with constant-size message complexity can be simulated topologically by graph assembly systems.  Of course, for real-world applications, agents need to inhabit a physical space, under geometric constraints, so we also investigate what distributed systems can be simulated by graph assembly systems whose agents are placed on the points of $\mathbb{Z}^2$ and $\mathbb{Z}^3$.  We define a class of network graphs such that all distributed systems that send only constant-size messages and whose network graph is in that class, can be simulated in two dimensions by a particular type of graph assembly system.  Further, for any network graph not in that class, there exists a distributed system (with constant-size message complexity) that cannot be simulated in two dimensions by such a graph assembly system.  Finally, we show that the same distributed systems that can be simulated topologically, can also be simulated in $\mathbb{Z}^3$, though our proof uses graph assembly systems of much greater complexity than the topological proof did.

We then use these simulation theorems to adapt known distributed algorithms to the realm of self-assembly.  In particular, we adapt a recent algorithm due to Schneider and Wattenhofer~\cite{logstarMIS}---which finds a Maximum Independent Set in asymptotically optimal time and message complexity for ``growth-bounded'' network graphs---to show that a self-assembling computation can execute a subroutine to find an MIS without consuming much geometric space.  More formally, we define a complexity measure, \emph{rectangular surface cost}, for a self assembling computation, which in $\mathbb{Z}^3$ means the volume of the minimal rectangular solid that contains all agents that perform the computation. We simulate Schneider and Wattenhofer's algorithm, and a \emph{local synchronizer} that adapts their synchronous algorithm to the asynchrony of self-assembly, to show that, for growth-bounded network graphs, running a subroutine to compute an MIS only causes a computation's rectangular surface cost to increase by a constant factor, regardless of the size of the graph.  That concludes the results of this paper.

Several researchers have expressed the intuition that self-assembly and distributed computing are related.  Klavins, in particular, reported programming self-assembling robots with graph assembly systems, and called graph grammars ``distributed algorithms''~\cite{klavins-csm07}.  However, the rigorous application of distributed computing results to the field of self-assembly is quite recent.  The first such application appeared in~\cite{sterling}, and a tile assembly simulation of the consensus problem for some systems of distributed processes appeared in~\cite{datsa}.

The rest of the paper is structured as follows.  Section~\ref{section:background} provides background on graph assembly systems and Degano and Montanari's graph grammar characterization of distributed systems.  Section~\ref{section:gas-as-ds} embeds graph assembly systems into the graph grammar characterization of distributed systems and uses that to prove a generalization of Soloveichik and Winfree's theorem for local determinism.  In Section~\ref{section:simulation} we prove distributed system simulation theorems for topological and geometric graph assembly systems.  Section~\ref{section:surfacecost} applies these simulation theorems to prove an upper bound on the surface cost of the self-assembled computation of MISes for growth-bounded graphs.  In Section~\ref{section:conclusion} we summarize our work and suggest directions for future research.
\section{Background} \label{section:background}
\subsection{Graph assembly systems} \label{section:graphassemblysystems}
In this subsection, we provide the basic definitions of graph assembly systems.  Intuitively, the vertices of a graph represent the self-assembling agents in a system, the edges of the graph represent the current bonds between the agents, and the labels on the vertices represent the current physical conformations of the agents.  The graph rewriting rules state that if agents are in the correct conformations, and have the appropriate binding relationship, then they can change relationships, by associating, disassociating, and/or changing conformations.  We refer the reader to~\cite{Klavins04directedself-assembly} for several motivating examples.

All graphs in this subsection are simple labeled graphs over a finite alphabet $\Sigma$.  Later in the paper we will extend these graphs to hypergraphs.  For now, a \emph{graph} $G=(V,E,l)$ is a triple, where $V$ is a set of vertices, $E$ a set of edges, and $l:V \rightarrow \Sigma$ a labeling function.  If $G$ is a graph, we sometimes write $V_G$ and $E_G$ to denote the vertices, or edges, of $G$, respectively.  A \emph{rule} is a pair of graphs $r=(L,R)$ where $V_L=V_R$.  $L$ is the \emph{left-hand side of $r$}, and $R$, the \emph{right-hand side of $r$}.

Let $G_1$ and $G_2$ be graphs.  A function $h$ from $V_{G_1}$ to $V_{G_2}$ (often written $h:G_1 \rightarrow G_2$) is a \emph{label preserving embedding} if (1) $h$ is injective; (2) $\{x,y\} \in E_{G_1} \Rightarrow \{h(x),h(y)\} \in E_{G_2}$; (3) $l_{G_1} = l_{G_2} \circ h$.  A rule $r$ \emph{is applicable to a graph $G$} if there exists an embedding $h:L \rightarrow G$.  An \emph{action} on a graph $G$ is a pair $(r,h)$ such that $r$ is applicable to $G$ as witnessed by embedding $h$.
\begin{definition}
Let $G=(V,E,l)$ be a graph, $r=(L,R)$ a rule applicable to $G$, and $(r,h)$ an action.  The \emph{application of $(r,h)$ to $G$} produces a new graph $G'=(V',E',l')$, defined as follows.
\begin{align*}
V' &= V \\
E' &= \left[E \setminus \left\{\{h(x),h(y)\} \mid \{x,y\} \in L \right\}\right] \cup \left\{\{h(x),h(y)\} \mid \{x,y\} \in R\right\} \\
l'(x) &= \begin{cases}
            l(x) \textrm{ if } x \notin h(V_L) \\
            l_R \circ h^{-1}(x) \textrm{ otherwise} \\
         \end{cases}
\end{align*}
\end{definition}
\begin{definition}
A \emph{graph assembly system} is a pair $(G_0, \Phi)$, where $G_0$ is the \emph{initial graph} and $\Phi$ is a (finite) set of rules, called the \emph{rule set}.
\end{definition}
Intuitively, $G_0$ represents the initial configuration of self-assembling agents, before any binding rules have been applied; while $\Phi$ characterizes the binding rules of the system.

We now define the notion of a language generated by a graph assembly system.
\begin{definition}
Let $G=(G_0,\Phi)$ be a graph assembly system.  A connected graph $H$ is \emph{reachable} in $G$ if there exists a sequence of rules in $\Phi$ that can be applied to $G_0$ in order to produce $H$.  We write $\mathcal{R}(G_0,\Phi)$ for the set of graphs reachable in $G$.  A connected graph $H \subseteq \mathcal{R}(G_0,\Phi)$ is \emph{stable} if there exists no rule in $\Phi$ that can be applied to $H$.  The \emph{language} of $G$, written $\mathcal{L}(G)$, is the set of stable graphs that are reachable in $G$.
\end{definition}
\subsection{Background on grammars for distributed systems (GDS)}
In 1987, Degano and Montanari proposed a characterization of distributed systems based on graph rewriting~\cite{deganomontanari}, which they called ``Grammars for Distributed Systems,'' or GDS.  A more complete introduction can be found in~\cite{sa-gg-ds}, but briefly, a GDS is a triple $(\Sigma, \mathcal{D}_0, P)$, where $\Sigma$ is an alphabet of events and processes that can legally appear in a distributed computation, $\mathcal{D}_0$ is an initial finite distributed system with no events, and $P$ is a set of graph productions that characterizes legal computation steps.  Degano and Montanari defined an ultrametric space of temporally ordered computations, and used this to prove that any weakly fair GDS computation has a result that is final, \emph{i.e.}, it converges to a limit to which no graph production can be legally applied.
\begin{definition}
A \emph{computation} for GDS $G$ is a (finite or infinite) sequence $\{\mathcal{D}_i\} = \langle \mathcal{D}_0,\mathcal{D}_1,\ldots\rangle$ such that $\mathcal{D}_i \xrightarrow{G} \mathcal{D}_{i+1}, i=0,1,\ldots$.  A distributed system $\mathcal{D}$ is \emph{final} if there exists no $\mathcal{D}'$ such that $\mathcal{D} \xrightarrow{G} \mathcal{D}'$.  A computation is \emph{successful} iff its result is final.  A computation is \emph{weakly fair} iff any process to which a production can be applied will eventually have some production applied to it.  The \emph{language} $\mathcal{L}(G)$ \emph{generated by} $G$ is the set of the distributed systems that are the results of all successful computations of $G$.
\end{definition}
Recall that an \emph{ultrametric} on a set $I$ is a function $d:I \times I \rightarrow \mathbb{R}_+$ that is reflexive, symmetric, and satisfies the condition $d(x,z) \leq \max \{d(x,y),d(y,z)\}$.  If $d$ is an ultrametric on $I$, then $(I,d)$ is called an \emph{ultrametric space}.

Given a distributed system $\mathcal{D}=(N,S,f,l,\leq)$ and a subsystem $s \in S$, let $\textrm{depth}(s)$ be the natural number defined as the cardinality of a longest chain (without repetitions) consisting of $\leq$-predecessors of $s$.  Then for any distributed system $\mathcal{D}$ and natural number $n$, we can define the \emph{truncation} $[\mathcal{D}]_n$ of $\mathcal{D}$ at depth $n$ by $[\mathcal{D}]_n=(N',S',f',l',\leq')$, where
\begin{align*}
S' &= [S]_n = \{s \in S \mid \textrm{depth}(s) < n \} \\
N' &= \{ n \mid (\exists s \in S)(\exists i \in \mathbb{N}) f(s)|_i = n \} \\
f',l',\leq' & \textrm{ are the restrictions of } f,l,\leq \textrm{ to } S' \textrm{ respectively.} \\
\end{align*}
\begin{definition}
Let $\mathcal{D}_1$ and $\mathcal{D}_2$ be distributed systems.  The \emph{distance} $d(\mathcal{D}_1,\mathcal{D}_2)$ is defined as
\begin{displaymath}
d(\mathcal{D}_1,\mathcal{D}_2) = \begin{cases}
                                    2^{-\max\{n \mid [\mathcal{D}_1]_n = [\mathcal{D}_2]_n\}}& \text{ if such a maximum exists} \\
                                    0& \text{ otherwise.}
                                  \end{cases}
\end{displaymath}
\end{definition}
Let $\mathfrak{D}$ be the set of all distributed systems in which each subsystem has a finite number of predecessors, and in which only finitely many concurrent steps occur simultaneously.  Let $\textrm{Fin}(\mathfrak{D})$ be the set of all finite distributed systems in $\mathfrak{D}$.  Degano and Montanari proved the following.
\begin{thm} \label{theorem:ultrametric}
$(\mathfrak{D},d)$ is an ultrametric space.  Further, $(\mathfrak{D},d)$ is the completion of $(\textrm{Fin}(\mathfrak{D}),d)$.  Every infinite computation $\{\mathcal{D}_i\}$ is a (convergent) Cauchy sequence in $(\mathfrak{D},d)$.
\end{thm}
If a computation is finite, its \emph{result} is the last element of the computation.  If the computation is infinite, its result is its limit in $(\mathfrak{D},d)$.  This limit is guaranteed to exist by Theorem~\ref{theorem:ultrametric}. Because of this, Degano and Montanari were also able to prove the next theorem.
\begin{thm} \label{theorem:weakfair}
An infinite computation is weakly fair iff it is successful.
\end{thm}
\section{Graph Assembly Systems are Distributed Systems} \label{section:gas-as-ds}
\subsection{Embedding Graph Assembly Systems in GDSes}
It is a fundamental observation of this paper that graph assembly systems can be embedded into grammars for distributed systems, in the following rigorous sense.
\begin{thm} \label{theorem:gasgds}
Let $G=(G_0,\Phi)$ be a graph assembly system.  Then there is a grammar for a distributed system $G^*=(\Sigma,\mathcal{D}_0,P)$ and an injective mapping $\psi:\mathcal{R}(G_0,\Phi) \rightarrow (\mathfrak{D},d)$ such that
\begin{enumerate}
\item $\psi(G_0)=\mathcal{D}_0$.  (The initial graph is the initial distributed system.)
\item $H \in \mathcal{L}(G) \Leftrightarrow \psi(H) \in \mathcal{L}(G^*)$.  (Each graph in the language of $G$ corresponds to a unique distributed system that can be reached from the initial state by a legal computation.)
\item If $\langle G_0,H_1,H_2,\ldots \rangle$ is a (finite or infinite) sequence such that each graph in the sequence can be obtained by applying rules from $\Phi$ to the graph preceding it in the sequence, then $\langle \mathcal{D}_0,\psi(H_1),\psi(H_2),\ldots \rangle$ is a legal computation in $G^*$.
\end{enumerate}
\end{thm}
We defer the proof of Theorem~\ref{theorem:gasgds} to the Appendix.
\subsection{Generalization of local determinism} \label{section:localdet}
We now apply Theorem~\ref{theorem:gasgds} to generalize a theorem of Soloveichik and Winfree about tile self-assembly.  They were interested in guaranteeing that a tile assembly system would always form a unique terminal assembly, and defined a sufficient condition, \emph{local determinism}, that would guarantee such uniqueness.  For reasons of space, we defer the formal definition of the Winfree-Rothemund Tile Assembly Model---and a graph assembly system characterization of it---to the Appendix.  We use the ultrametric space of legal GDS computations to extend Soloveichik and Winfree's idea to arbitrary graph assembly systems.

First, we define a generalized notion of local determinism.
\begin{definition}
Let $G=(\Sigma,\mathcal{D}_0,P)$ be a GDS.  We say $G$ is \emph{locally deterministic} if the following holds for all computations $\{\mathcal{D}_i\}$ generated by $G$.  For any $k>1$ and any process $s \in \mathcal{D}_k$, let $\mathcal{D}_j$ be maximal such that $\mathcal{D}_j \in \{\mathcal{D}_i\}$ and $s \notin \mathcal{D}_j$.  Then there is exactly one production applicable to the parents (\emph{i.e.}, immediate $\leq$-predecessors) of $s$, and that production produces $s$ in the location where it appears in $\mathcal{D}_k$.
\end{definition}
In words, the initial graph and the productions of $G$ are such that the local subsystems of any finite computation entirely determine their children at the future computation step when a production is applied to them.  Because the space $(\mathfrak{D},d)$ is complete, we obtain the next theorem.
\begin{thm} \label{theorem:localdet}
Let $G=(\Sigma,\mathcal{D}_0,P)$ be a GDS that is locally deterministic. Then all (finite or infinite) weakly fair computations generated by $G$ have the same result.
\end{thm}
As graph assembly systems---and GDS's---can simulate a wide range of self-assembly models, including Winfree-Rothemund tile self-assembly, Soloveichik and Winfree's theorem is a corollary to Theorem~\ref{theorem:localdet}.
\begin{cor}[Soloveichik and Winfree~\cite{solwin}]
Let $\mathcal{T}=(T,\sigma,\Sigma,\tau,R)$ be a tile assembly system that is locally deterministic (in the sense of tile self-assembly, as defined in the Appendix).  Then $\mathcal{T}$ has a unique terminal assembly.
\end{cor}
\section{Self-assembly simulation of distributed systems} \label{section:simulation}
\subsection{Topological simulation of distributed systems}
Graph grammars---and graph assembly systems---are Turing universal.  However, the weakness of the graph grammar characterization of self-assembly is that it captures only the topology, and not the geometric constraints of the system.  This means that we can simulate any single processor (Turing machine, finite state machine, \emph{etc.}) using self-assembling agents in the plane, but it may not be possible to simulate a network of distributed processors, because the communication between processors may interfere with the system's ability to grow, depending on how the agents embed themselves into their geometric environment.  To provide a specific example, it is not possible for the Winfree-Rothemund Tile Assembly Model to simulate a 3-consensus object in two-dimensional tile assembly---though it can be done in three dimensions---because there is no way to ensure that three independently-growing subassemblies can have wait-free access to a common decision point~\cite{datsa}.

In this section, our objective is to use graph assembly systems to simulate ``classical'' distributed systems.  We first present a self-assembly simulation that considers only topology, and not geometric constraints.  We then include greater physical realism, by considering graph assembly systems that embed in the plane, and in 3-space.

For the rest of this paper, we will let $\mathcal{M}$ be an asynchronous message-passing model of distributed computing with $n$ processors, such that each processor runs forever, and can send and receive messages of constant-size complexity.  The assumption about constant-size message complexity is to make our proofs simpler, as we can represent each possible message with a distinct self-assembling agent, instead of a group of agents.  We require that each processor run forever to ensure that our self-assembly simulations preserve a fact about ``classical'' distributed systems: the number of messages has no effect on a processor's ability to perform correctly.  This is an important consideration once we consider simulations embedded into a geographic environment, as the agents passing messages could conceivably block the progress of agents simulating a processor, or vice/versa.  Moreover, if graph assembly systems can simulate some $\mathcal{M}$, all of whose processors run forever, then they can also simulate $\mathcal{M}'$, with the same network graph as $\mathcal{M}$, but containing processors that halt.

Intuitively, $\mathcal{M}$ can be simulated by a system of self-assembly if the logic of each processor can be simulated by a distinct subsystem, and the simulation of any message sent from processor $p_i$ to processor $p_j$ eventually arrives (with probability one) at the subsystem that is simulating $p_j$, and is incorporated into that subsystem's execution.  We formalize that intuition as follows.
\begin{definition}
Let $G$ be a graph assembly system, and $G^*$ its induced GDS.  Then we say $G^*$ \emph{simulates} $\mathcal{M}$ if:
\begin{enumerate}
\item There is a 1-1 mapping $h$ from configurations of $\mathcal{M}$ to distributed systems derivable from $G^*$.
\item If $C_0,\phi_0,C_1,\phi_1 \cdots C_i,\phi_i$ is a legal execution segment of $\mathcal{M}$, then $h(C_0) \longrightarrow h(C_1) \longrightarrow \cdots \longrightarrow h(C_i)$ is a legal computation derivable from $G^*$.
\item If there is no legal execution segment from $C_0$ to $C_1$ in $\mathcal{M}$, then there is no legal computation derivable from $G^*$ such that $h(C_0) \longrightarrow h(C_1)$.
\item Let $C$ be a configuration of $\mathcal{M}$ and $\mathcal{C}$ be a set of configurations of $\mathcal{M}$.  If $\mathcal{M}$ is such that, upon achieving configuration $C$, it must eventually achieve some configuration $C' \in \mathcal{C}$, then $G^*$ is such that, if it ever reaches $h(C)$ then it must achieve $h(C')$ for some $C' \in \mathcal{C}$.  (Note that $\mathcal{C}$ may be an infinite set.)
\item If $\Phi$ is a legal, finite execution segment in $\mathcal{M}$ that contains the event that $p_i$ places message $m$ in the outbuffer intended for processor $p_j$, then, with probability one, all legal computations derivable from $h(\Phi)$ will include some $\mathcal{D}$ such that $h^{-1}(\mathcal{D})$ is a configuration of $\mathcal{M}$ in which $m$ has arrived at $p_j$.
\item If in configuration $C$ of $\mathcal{M}$ all processes have halted, then the distributed system $h(C)$ derivable from $G^*$ is terminal.
\end{enumerate}
Further, we say $G$ \emph{simulates} $\mathcal{M}$ if $G^*$ does.
\end{definition}
Ignoring geometric constraints for the moment, we can obtain the following theorem that shows graph assembly systems can topologically simulate distributed systems.
\begin{thm} \label{theorem:sim}
Let $\mathcal{M}$ be an asynchronous message-passing model of distributed computing such that all processors run forever, and each processor can send messages of size bounded by some constant $k$.  Then there is a graph assembly system that simulates $\mathcal{M}$.
\end{thm}
\subsection{Simulation of distributed systems by agents with geometric constraints}
We turn now to self-assembly simulations when the assembling agents are constrained to embed into a particular geometric environment.  Each agent has a ``size'': we will work in either the two-dimensional or three-dimensional integer lattice, and at most one agent can be placed at a given lattice point.  We will characterize only simulations achieved by \emph{passive} self-assembly---self-assembly in which the agents take no action once they adhere to the growing configuration.  Graph assembly systems can also model \emph{active} self-assembly, in which the agents are ``smarter,'' and can run algorithms to dissolve bonds they have made.  We will not consider that here.  Moreover, we will only consider the following type of simulation in this paper.
\begin{definition}
Let $\mathcal{M}$ be a system of distributed processors, and $G$ a graph assembly system that simulates $\mathcal{M}$.  We say that $G$ \emph{simulates processors independently} if, for any $i \neq j$,  the convex hull of the area filled by agents simulating $p_i$ is disjoint from the convex hull of the area filled by agents simulating $p_j$.
\end{definition}
The purpose of the preceding definition is to require that a graph assembly system not ``interweave'' simulation of multiple processors.  On the one hand, this requirement will make our proofs easier.  On the other hand, such simulations are important in their own right, as they are more resilient to certain errors: incorrect binding in one area of the assembly will only affect the simulation of one processor, as the others are simulated in disjoint areas.

Let $\mathcal{C} = \{H \mid H \textrm{ is a directed graph and  } (\forall v \in V(H))[ \textrm {indegree}(v)+\textrm{outdegree}{(v)} \leq 2] \}$.  If the network graph of a distributed system is a member of $\mathcal{C}$, that is a sufficient condition for the distributed system to be simulated by planar self-assembly.
\begin{thm} \label{theorem:planarsim}
Let $\mathcal{M}$ be a system of distributed processors with constant-size message complexity, such that each processor runs forever.  If the network graph of $\mathcal{M}$ is an element of $\mathcal{C}$, then there exists a graph assembly system $G$ that simulates $\mathcal{M}$, simulates processors independently, and embeds in the plane.
\end{thm}
On the other hand, for any graph not in $\mathcal{C}$, there is a system of distributed processors with that network graph that cannot be simulated by the restricted version of planar self-assembly we are considering.
\begin{thm} \label{theorem:nonplanar}
Let $H \notin \mathcal{C}$ be a graph.  Then there exists a system of distributed processors $\mathcal{M}$ (of constant-size message complexity), which cannot be simulated by any graph assembly system that embeds in the plane and simulates processors independently.
\end{thm}
By contrast, if agents have all of 3-space to work with, they can simulate $\mathcal{M}$ with any network graph.
\begin{thm} \label{theorem:3spacesim}
Let $\mathcal{M}$ be a system of distributed processors with constant-size message complexity, such that each processor runs forever.  There exists a (passive) graph assembly system $G$ that embeds in $\mathbb{Z}^3$ and simulates $\mathcal{M}$, simulating processors independently.
\end{thm}
\section{Bounding the surface cost of self-assembling computations} \label{section:surfacecost}
We now apply the ability to simulate systems of distributed processors in 3-space, to show that finding a Maximum Independent Set can be performed by self-assembling agents in a physically compact way for certain network graphs.  Self-assembling agents take up space when they perform computations, and, other things being equal, it would be helpful if they took up as little space as possible.  One reason for this is to promote modularity of self-assembling systems: if we know one functionality will require at most $X$ physical space, and a second functionality will require at most $Y$ physical space, then if we budget a rectangular solid that contains enough space for both computations (plus overhead for connection), we are guaranteed we can combine both functionalities into a larger system, without modifying the internal structure of either computational process.

Since our focus is on modular connection of self-assembling subsystems into a larger whole, we will focus on the minimal convex solid that contains the entirety of a subsystem, instead of the complexities of the surface of the shape assembled.  That is the motivation for the following definition.
\begin{definition}
Let $A$ be an assembly obtained by a computation of a graph assembly system, and assume $A$ is embedded into geometric space $S$.  The \emph{convex surface cost of $A$} is the size of the convex hull of $A$.  This cost will be either an area or a volume for the cases we are interested in: agents embedded in the plane or 3-space.  In the specific case of agents embedding in $\mathbb{Z}^3$, we define the \emph{rectangular surface cost} of $A$ as the volume of the minimal rectangular solid that fully contains $A$.
\end{definition}
While randomized algorithms have been very helpful in distributed computing, one drawback of many such algorithms is that they only terminate within a certain expected time, instead of guaranteeing termination by some point.  Simulating such an algorithm could be problematic in the world of self-assembly, as agents might grow beyond an expected boundary and collide with other parts of the configuration.  One alternative to randomization is ``deterministic coin flipping,'' which uses processor ID's to perform ``coin-flipping-like'' operations.  We will simulate a deterministic coin flipping algorithm for MIS due to Schneider and Wattenhofer~\cite{logstarMIS}, to show that computing an MIS on so-called \emph{growth bounded graphs} only adds a constant factor to the surface cost of the simulation of any algorithm in which the MIS-computation appears.
\begin{definition}
Let $H=(V,E)$ be a graph.  H is \emph{growth bounded} if there is a polynomial bounding function $f(r)$ such that for each node $v \in V$, the size of a MIS in the neighborhood $N^r(v)$ is at most $f(r)$, for all $r \geq 0$.  (Here $N^r(v)$ is the set of nodes reachable from $v$ in $r$ hops.)
\end{definition}
The motivation behind this definition was to capture the notion that ``vertices are connected if they are physically near one another.''  Growth bounded graphs generalize well-known graph classes used to study wireless networks, such as unit disc graphs.

Schneider and Wattenhofer's MIS algorithm has log-star time and message complexity.  However, if we limit our consideration of self-assembling systems to ones that contain no more agents than there are particles in the universe, we can approximate the log-star function with a constant function, and obtain the following theorem.
\begin{thm} \label{theorem:surfacecost}
There exists a constant $k$ such that the following holds.  Let $\mathcal{M}$ be a system of distributed processors of constant-size message complexity, such that $\mathcal{M}$ runs algorithm $A$ and always terminates, whose network graph is a growth-bounded graph, and such that $\mathcal{M}$ contains no more nodes than there are atoms in the physical universe.  Define algorithm $B$ as, ``Run algorithm $A$, then compute a Maximum Independent Set of the network,'' and define $\mathcal{M}'$ as a system with the same network graph as $\mathcal{M}$ that executes $B$.  Let $G$ be a graph assembly system that simulates $\mathcal{M}$ (simulating processors independently), whose surface cost for $A$ is minimal, and is contained in a rectangular solid of dimensions $l,w,h$.  Then there is a graph assembly system $G'$ that simulates $\mathcal{M}'$ (simulating processors independently), whose surface cost is contained in a solid of dimensions $l+k, w+k,h+k$.
\end{thm}
Expressed in big-oh notation, $\mathcal{O}$(rectangular surface cost of $A) = \mathcal{O}$(rectangular surface cost of $B$), with processors simulated independently, as the number of nodes of $\mathcal{M}$ goes to a large-but-finite number, such as $2^{65536}$.

To execute the MIS algorithm, we modify our simulation slightly, to allow for processors starting with unique ID's.  We model this by having each processor start with an input string that is encoded as a string concatenated to a special character concatenated to a second string.  The first string is the processor ID, and the second is the initial input to the processor, which we already know how to simulate.  When the algorithm executes the deterministic coin flipping steps, the wedge construction operates on the string that simulates the processor ID.

Critical to the proof of Theorem~\ref{theorem:surfacecost} is the fact that we can simulate execution of the MIS algorithm in asynchronous self-assembly, even though the algorithm itself is synchronous.  To accomplish this, we adapt the distributed computing notion of a \emph{local synchronizer} to self-assembly.  A local synchronizer is a distributed algorithm that allows neighboring processors to process messages in a particular order, consistent with the round structure of a synchronous algorithm.  We adapted local synchronizer ALPHA, which requires constant-many messages between each pair of neighbors per round.  As the whole MIS algorithm runs for only constant-many rounds, the growth of the overall assembly along any particular vector in $\mathbb{Z}^3$ is constant, and the surface cost of the total computation increases by only a constant factor.
\section{Conclusion} \label{section:conclusion}
In this paper, we built an underpinning of rigor for the intuition that self-assembling systems are distributed systems.  We then used known machinery from distributed computing to generalize an existing result in self-assembly (local determinism implies unique terminal assembly), and to prove a complexity upper-bound for a subroutine (finding an MIS) that is often used in distributed algorithms.

However, our theorems were limited to distributed systems of constant-size message complexity, and simulations by passive self-assembling systems in which processors were simulated independently.  Directions for future work include investigation of the simulation of other types of distributed systems, as well as the properties of active graph assembly systems, and simulations that would interweave configurations that simulate processors.  Perhaps most importantly, though, we made the assumption throughout this paper that all self-assembly was error-free, both at the initial binding steps, and also that no part of the growing assembly would degrade over time.  The use of distributed computing techniques to manage fault tolerance in self-assembling systems will be, we believe, a fundamental area of research.
\section*{Acknowledgements}
I am grateful to Jim Aspnes and Roger Wattenhofer for helpful discussions.

redpajama_set_name: RedPajamaArXiv


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Little girls are tricked very early on, especially in their personal "book study", into the consequences of a girl being "desecrated" and this desecration coming to light. For this purpose the story of Dina and her brothers is dealt with in great detail and again and again, Genesis 30:21; 34:1, 3, 5, 13, 26; 46:15. A young child cannot understand these Bible texts, therefore in "book study" an experienced "sister" makes it clear to the child how this text is to be understood.
Dina was raped by a man, then her brothers avenged her and brought great shame on God's people and many people had to die for this reason. What does a little child learn from this? I think that a small child can only conclude from this that it is better never to admit that you have been raped, because otherwise you bring shame upon yourself and Jehovah's Witnesses and it can even happen that many people die. So much for preparation.
What happens if a child nevertheless reveals himself to his parents, despite the danger of shame on Jehovah's Witnesses and the death of many people?
If the child cannot name two witnesses, the defendant will also be questioned by a "legal committee".
If the perpetrator confesses sexual abuse and repents, he is rebuked by the "elders" and everything is all right again in the eyes of WTS, for Jehovah has forgiven the sinner in the eyes of WTS. This means that the victim also has to forgive the perpetrator in this case, and thus considers the "matter" done.
If the perpetrator confesses and shows no remorse, then the community is taken away from him.
If the perpetrator denies the sexual abuse, the victim of a sexual abuse will be rebuked by the "elders" in another " Legal Committee", and if it does not accept this " rebuke", it will lead to community deprivation if the victim is already "baptized" or has been announced as "official preacher".
Child abuse will not be reported under any circumstances! This procedure is justified by the following Bible text: 1.Tim. 5:19 and 1.Corinthians 6:1-7.
How can a religious community in Germany that behaves as mentioned above sue for the title "public corporation" in court?
When WTS is clearly breaking the law?
(1) The care of persons shall include in particular the duty and right to care for, educate, supervise and determine the residence of the child.
(2) Children have a right to a non-violent upbringing. Physical punishment, mental injuries and other degrading measures are inadmissible.
(3) The family court shall, upon request, assist the parents in the exercise of personal care in appropriate cases.
Is this "Legal Committee" measure not highly degrading for a child who has just experienced sexual abuse?


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text:
Lake Albano and Castelgandolfo
Courtesy of National Museums Liverpool
75.5 x 100 cm
29 3/4 x 39 3/8 in.
Lady Lever Art Gallery, National Museums Liverpool. To license images click here.
A view of the curve of a river, which appears in the middle distance and from which the banks rise steeply. In the foreground to right and left are groups of trees, between which sit a woman with a child and a man. Disappearing over the edge of a hill, a man on a white pony leads a donkey by its halter. Across the river in the background a path slants down the face of a cliff, which is surmounted by the town of Castelgandolfo.
RA 1774 (74)?; London 1925 (17); Manchester 1925 (17); Brussels 1929 (197); Paris 1953 (92); Rotterdam 1955 (67); Montreal 1957 (74)
James Orrock
Signed 'RW.' on stone lower centre [monogram, the R reversed]
Castelgandolfo was and remains the summer residence of the popes. It was built for Urban VIII (1623-44) to the designs of Carlo Maderna. The site of the ancient town, Alba Longa, is nearby and Pompey and Domitian, among other celebrated ancient Romans, built villas on the shore of the lake.
D163 Lake Albano and Castel Gandolfo, Victoria & Albert Museum D312 Castel Gandolfo; A View of the Town from across the north end of Lake Albano, with a Shepherd in the Foreground, Private Collection
D163 Lake Albano and Castel Gandolfo, Victoria & Albert Museum
D312 Castel Gandolfo; A View of the Town from across the north end of Lake Albano, with a Shepherd in the Foreground, Private Collection
[1] Claude Lorrain Pastoral Landscape with Lake Albano and Castel Gandolfo, oil on copper, 1639, Fitzwilliam Museum, Cambridge [2] Jonathan Skelton, Lake Albano and Castel Gandolfo, watercolour, 1758, Whitworth Art Gallery, The University of Manchester [3] Joseph Wright of Derby Albano, 1790, National Museum Wales, Cardiff (NMW A 109) [4] J.-B.-C. Corot, Lake Albano and Castel Gandolfo, oil on paper, 1826-28, Metropolitan Museum of Art, New York
[1] Claude Lorrain Pastoral Landscape with Lake Albano and Castel Gandolfo, oil on copper, 1639, Fitzwilliam Museum, Cambridge
[2] Jonathan Skelton, Lake Albano and Castel Gandolfo, watercolour, 1758, Whitworth Art Gallery, The University of Manchester
[3] Joseph Wright of Derby Albano, 1790, National Museum Wales, Cardiff (NMW A 109)
[4] J.-B.-C. Corot, Lake Albano and Castel Gandolfo, oil on paper, 1826-28, Metropolitan Museum of Art, New York
Bury 1947, pl. 28; Ford 1951, p. 61 under no. 66, WGC, p. 191, pl. 64b; Egerton 1990, pp. 185-86
Kate Lowry has noted: Oil on canvas, relined. Dark foliage masses and clouds are Dutch in style. Severe drying cracks in lake and some mature cracks in centre sky, possibly due to reworking by the artist. Brown reserve for foliage visible upper left.
Lake Albano and Castel Gandolfo, Victoria & Albert Museum
Richard Wilson (1713/14-1782), Castel Gandolfo; A View of the Town from across the north end of Lake Albano, with a Shepherd in the Foreground, Private Collection
Richard Wilson (1713/14-1782) Lake Albano and Castelgandolfo, Birmingham Museums & Art Gallery
Richard Wilson (1713/14-1782) View of Castel Gandolfo and Lake Albano, Private Collection, England
London, National Gallery, Millbank (Tate Gallery), 26 June - 30 September 1925
Manchester City Art Gallery, 22 October - 5 December 1925
Rotterdam, Museum Boymans van Beuningen, 5 March - 28 April 1955
Brussels, Musée Moderne, 12 October - 1 December 1929
Montreal Museum of Fine Arts, 1957-58
Brinsley Ford, The Drawings of Richard Wilson
Adrian Bury, Richard Wilson, R.A.: The Grand Classic
Judy Egerton, Wright of Derby


text:
Home > Forum > Surnames > Brigham
Re: THOMAS BRIGHAM 1632 CONNECTION
By genealogy.com user March 16, 2001 at 07:49:44
In reply to: THOMAS BRIGHAM 1632 CONNECTION
JAMES MAGINNIS 2/20/01
I have this
JONATHAN Brigham, son of Joel and Mary (CHURCH) BRIGHAM; born in Marlboro, Mass., 29 Oct., 1754; died in Mayville, N.Y .26 July, 1848;aged 94 years, (*Buried Mayville) married (1), 5 Jan., 1774, Lydia STEVENS, born 8 May, 1758; died in Mayville, 4 Feb., 1828; married (2), Sarah (OLDS) Brigham, widow of his cousin Jonathan, . He resided first in Marlboro; moved to Madison, N. Y., 1796; thence to Sheridan, N. Y., 1810; last to Mayville, in 1813.
Children (by first wife), all born in Marlboro, except the youngest born in Madison:
1. Stephen 6, b. 24 Aug., 1780.(came to SHERIDAN in 1816)
died in Sheridan, N. Y., 13 Nov., 1856; married in 1800, Mary WILCOX, in Madison, N. Y.; he removed with his father, in 1796, to Madison, N. Y.
Visit my web site on the History of Marlborough, Massachusetts which has the following surnames studied in depth with the history of Marlborough from 1660 to 1910 and a second section for 1910 to 1999.
AMES/EAMES/EMS, AMSDEN, ARNOLD, AXTELL, BAKER, BANISTER, BARNARD, BARNES, BENT, BENDER, BIGELOW, BOWKER, BRIGHAM, CHIPMAN, CHURCH, DADMAN, DEXTER, EAGER, FAY, FELTON, GATES, GLEASON, GODDARD, GOODALE/GOODEL/GOODELL, GOODENOW/GOODNO/GOODNOUGH, GODDARD/GODARD, HAGER, HAPGOOD,HOLYOKE, HOWE (HOW), HUDSON, JOHNSON, JOSLEN/JOS;IN/JOSLING, KERLY, KEYES/KEYS,
MAINERD/MAINARD/MAYNARD/MAYNERD, MORSE/MORS, NEWTON, PRIEST,RICE, STOW, TEMPLE, WARD and WOOD/WOODS.
It includes vital records ofMarlborugh and Sudbury, genealogies, family histories, cemetery inscriptions, pictures of over 50 gravestones, pictures of early homes as they look today and some as they looked in the past,Revolutionary and Civil War listings including were they served and regiments, early (1660 ) records of Marlborough, early documents (as early as 1700) even signatures of many of Marlborough's early settlers; stories of people and places.There are over 40 surnames which settled in Marlborough and intermarried and additional surnames without as much detail. More surname and information to be added as time allows.
The site is
http://freepages.history.rootsweb.com/~historyofmarlborough/http://freepages.history.rootsweb.com/~historyofmarlborough/
Check it out and please sign the guest book.
….john


1) How can I cover up and remove my scars without having to buy anything? Any home remedies with my limited supplies?
2) How can I hide my scars from the doctor? Do you think I can get away with wearing shorts and a tank top there? If not, I think I can cover up the scars on my legs with my hands...would that look suspicious?
I think that's all for now. No, I don't want to tell my parents about it. I already disappoint them enough. Thanks for reading and for the feedback!
As for your second question, I don't think it will be a problem to wear a top and shorts for your doctors appointment unless you would have to strip.
Also doctors have seen a lot. They won't mind. It can be really scary, to let a doctor see those scars, but they won't make a big deal out of it. Especially if they are old. If they are new they might ask, but most doctors are really sensible about the this. So it'll be alright.
And if your scared your mom might see when you are at the doctors you could always ask tell her, that you want to go in alone. Most parents respect that.
As for covering up. Sadly there's not much you can do. I tried different kind of things to get scars to fade, even scar oil can only do so much.
How old are your scars? Keeping them moisturized is a good idea. If they're relatively recent, you could wash them with soap in the shower to help exfoliate the area. You may even be able to mix a little bit of aloe with some baking soda to make some sort of a scrub. You said you don't have vitamin E oil but you can make a scrub with that so perhaps an aloe scrub would be similar.
I think you could wear shorts and a tank top there if you'd like to. Maybe you can let the doctor know that removing your clothes would make you uncomfortable. But, as it's been said, doctors definitely have seen a lot and scars won't be entirely unusual for them to see. You probably could cover the scars with your arms if you lay on your back and place them down your stomach and legs. Doctor's offices are sometimes cold, so you could drape a jacket over yourself as well.
If you live in a place where aloe grows, that can be used to heal scars. It's a little slow, but it does work after some time. We've been putting aloe on our scars for a couple weeks now, and they've faded quite a bit.
You can just go out and rip off a stalk, then remove the spikes on the sides and peel off the outer skin, then rub the soft and slimy stuff in the middle onto your scars. We usually apply it before bed and keep them on overnight, then wash it off when we take a shower.
If you can't get it, you could probably buy it somewhere. A good excuse would be you want to try to use it to get rid of acne or bug bites.
Thanks so much for all the responses! My scars are about a year old, so they probably won't fade significantly anymore. I'll try to make a scrub with aloe Vera and baking soda. Unfortunately, aloe doesn't grow where I live, but I do have bug bites and I own a lot of house plants, so I'll probably be able to buy my own plant with no suspicion. I feel a lot more reassured with all your suggestions.
You can wear long sleeves or pants or use some makeup to cover them. Scars dont fade easy, but I doubt your doctor will be fazed by them.
Your doctor shouldn't make a scene over your scars. But, if you truly feel to cover them up put on a pair of jeans or slap a few bandages on them.
Thanks for all of the responses! I think I'll be fine after reading all of your replies. Thanks again, everyone!


This category has everything that I do in my daily life. It depicts my lifestyle.It includes everything starting from decor, food, DIY, Health and Fitness etc. Precisely everything I love doing is under this section.


text:
Kenneth J. Dover
Biography: Sir Kenneth James Dover (1920-2010) became a Fellow and tutor at the University of Oxford in 1948. He became professor of Greek at the University of St. Andrews in 1955. Dover was educated at St. Paul's School and Balliol College, Oxford. Dover received a knighthood in 1977 for his contributions to Greek scholarship; he also received honorary degrees from the Universities of Oxford, St. Andrews, Birmingham, Briston, London, Durham, Liverpool, and Oglethorpe. Dover was president of Corpus Christi College, Oxford, from 1976 until 1986. Dover authored numerous books, including Theocritus: Select Poems (Macmillan Education, 1971; reprinted by Bolchazy-Carducci Publishers, 1985, 1987), Greek Homosexuality (Harvard University Press, 1978), Greek Popular Morality in the Time of Plato and Aristotle (University of California Press, 1974), Aristophanic Comedy (University of California Press, 1972), and Greek Word Order (Cambridge University Press, 1960).
Kenneth J. Dover's Books
Theocritus: Select Poems
Author: Kenneth J. Dover
This selection of the poems of Theocritus clearly illustrates his creative genius and rare powers of observation. Dover's introduction and extensive notes offer revealing insights into both the writing and the life and times of the poet.
Paperback, lxxii
Caesar & Vergil AP* Vocabulary Cards
Authors: David R. Pellegrino, Dennis De Young
The Living Voice of Greek Literature: A Recital of Greek Poetry - Selections from Homer's Odyssey Part 2
Ars longa, vita brevis: Art is long, life is short
Timeo Danaos et dona ferentis: I fear Greeks (even) bearing gifts


text:
Ralph Perry kan syfta på:

Ralph Barton Perry, amerikansk filosof
Ralph Perry (pokerspelare), rysk pokerspelare

redpajama_set_name: RedPajamaWikipedia


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